This chapter describes the various ways in which object oriented programming is achieved in Ada 95. The main facilities upon which this is based are
These topics were discussed in some detail in Part One and are further discussed in other chapters in this part (see Chapter 3 for types, including abstract types and abstract subprograms, and Chapter 12 for generic parameters). The discussion in this chapter is more idiomatic and concentrates on how the features are used in Ada 95 and briefly contrasts the approach with that of other object oriented languages.
Ada has been traditionally associated with object oriented design [Booch 86], which advocates the design of systems in terms of abstract data types using objects, operations on objects, and their encapsulation as private types within packages. The "ingredients" of object oriented design may be summarized as follows:
Ada 83 was well suited to supporting the paradigm of object oriented design. Object oriented programming, as that term has evolved over the past decade, builds upon the base of object oriented design, adding two other ingredients: inheritance and polymorphism. While the specific properties of these two facilities vary from one programming language to another, their essential characteristics may be stated as
Ada 83 has been described as an object based language; it does not have the support for inheritance and polymorphism found in fully object oriented languages (see 4.7). Recognizing this, the Ada 9X Requirements reflect the need to provide improved support for this paradigm through three Study Topics [DoD 90] as follows.
S4.1-A(1) - Subprograms as Objects: Ada 9X should provide: 1 an easily implemented and efficient mechanism for dynamically selecting a subprogram that is to be called with a particular argument list; 2 a means of separating the set of subprograms that can be selected dynamically from the code that makes the selection. S4.3-A(1) - Reducing the Need for Recompilation: Ada 9X recompilation and related rules should be revised so it is easier for implementations to minimize the need for recompilation and for programs to use program structures that reduce the need for recompilation. S4.3-B(1) - Programming by Specialization/Extension: Ada 9X shall make it possible to define new declared entities whose properties are adapted from those of existing entities by the addition or modification of properties or operations in such a way that: * the original entity's definition and implementation are not modified; * the new entity (or instances thereof) can be used anywhere the original one could be, in exactly the same way.
Each of these Study topics can be understood in relation to object oriented programming. S4.1-A(1) seeks the ability to associate operations (subprograms) with objects, and to dynamically select and execute those operations. This is one basis on which to develop run-time polymorphism.
Among the various causes of excessive recompilation addressed by S4.3- A(1) are those arising from the breakage of an existing abstraction for the purpose of extending or otherwise reusing it to build a new abstraction.
The topic S4.3-B(1) implies the essence of object oriented programming as defined above. Alternatively, one might think of this in terms of two programming paradigms
Finally, it should be mentioned that there are two rather awkward problems to be addressed and solved in designing a compiled language for object oriented programming which retains efficiency and avoids unnecessary run-time decisions.
As will be seen, the solution adopted to these problems in Ada 95 illustrates our concern for clarity and the advantages of the building block approach.
Ada 95 generalizes the type facilities of Ada 83 in order to provide more powerful mechanisms for variant and class-wide program development and composition. Derived types in Ada 83 provided a simple inheritance mechanism: they inherited exactly the structure, operations, and values of their parent type. This "inheritance" could be augmented with additional operations but not with additional components. Ada 95 generalizes type derivation to permit type extension as we saw in II.1.
A tagged record or private type may be extended with additional components on derivation. Tagged objects are self-identifying; the tag indicates their specific type. Tagged types provide a mechanism for single inheritance as found in object oriented programming languages such as Simula [Birtwistle 73] and Smalltalk [Goldberg 83].
The following example of type extension is inspired by [Seidewitz 91]. We first declare
type Account_With_Interest is tagged record Identity: Account_Number := None; Balance : Money := 0.00; Rate : Interest_Rate := 0.05; Interest: Money := 0.00; end record; procedure Accrue_Interest(On_Account: in out Account_With_Interest; Over_Time : in Integer); procedure Deduct_Charges(From: in out Account_With_Interest);and can then extend it
type Free_Checking_Account is new Account_With_Interest with record Minimum_Balance: Money := 500.00; Transactions : Natural := 0; end record; procedure Deposit(Into : in out Free_Checking_Account; Amount: in Money); procedure Withdraw(From : in out Free_Checking_Account; Amount: in Money); Insufficient_Funds: exception; -- raised by Withdraw procedure Deduct_Charges(From: in out Free_Checking_Account);
The type Account_With_Interest is a tagged type. The type Free_Checking_Account is derived from it, inheriting copies of its components (Identity, Balance, Rate, Interest) and its operations (Accrue_Interest and Deduct_Charges). The derived type declaration has a record extension part that adds two additional components (Minimum_Balance and Transactions) to those inherited from the parent. The type adds some new operations (Deposit and Withdraw) and also overrides Deduct_Charges such that if the Balance was above the Minimum_Balance, no charges would be deducted. All components of the type, whether inherited or declared as a part of the extension, are equally accessible (unlike "nested" record types).
In Ada 83, the types declared in the visible part of a package had special significance for Ada's abstraction mechanisms. Such operations on user-defined types were first-class in a manner that parallels those of the predefined types. For derived types, these operations, together with the implicitly declared basic operations, were the derivable operations on a type.
With the increased importance of derived types for object oriented programming in Ada 95, the notion of the operations closely related to a type in this manner is generalized. The primitive operations of a type are those that are implicitly provided for the type and, for types immediately declared in a package specification, all subprograms with an operand or result of the type declared anywhere in that package specification. The domain is therefore extended to include the private part (but not the body).
Thus, in Ada 95, the derivable operations of Ada 83 have become "primitive operations" and the restriction of these operations to the visible part of a package has been eliminated. These changes support added capability: primitive operations may be private and a type and its derivatives may be declared in the same declarative region (this property is useful for building related abstractions and was used in the package New_Alert_System of Part One).
Primitive operations clarify the notion of an abstract data type for purposes of object oriented programming (inheritance and polymorphism) and genericity. They are distinguished from the other operations of a type in the following ways
Ada 83 used the term "class" (see [RM83 3.3]) to characterize collections of related types. The class of a type determines how the type is declared, the types it can be converted to, its predefined operations, and its structure. The class of a generic formal type parameter determines the operations that are available within the generic template. Types within a class have common structure and operations (see III.1.2 for a further description of the class structure of Ada).
Ada 95 formalizes the Ada 83 notion of class. A type and its direct and indirect derivatives, whether or not extended, constitute a derivation class. This definition allows for user-defined classes based on derivation. User-defined classes, like the language-defined classes, support type conversion, may be used to parameterize generic units and, in the case of tagged types, provide class-wide programming.
Explicit conversion is defined among types within a class, as it was in Ada 83 for types related by derivation, except that conversion is not allowed away from the root since additional components may be required. Such transformations require an extension aggregate as described in 3.8.
Thus, continuing the previous example, a value of Account_With_Interest can be extended to a value of Free_Checking_Account by providing values for the additional components Minimum_Balance and Transactions.
Old_Account: Account_With_Interest; ... New_Account: Free_Checking_Account := (Old_Account with Minimum_Balance => 0.00, Transactions => 0);
The Ada 95 rules for conversion between types in a class define the semantics of inherited operations in Ada 95 and are consistent with the semantics of inherited operations in Ada 83. Calling an inherited operation is equivalent to calling the parent's corresponding operation with a conversion of the actual to the parent type. Thus, inherited operations "ignore" the extension part.
User-defined classes may be employed to parameterize generic units. A new kind of generic formal, a generic formal derived type, may be used. This kind of formal is matched by any type in the class rooted at the generic formal's specified ancestor type.
For each tagged type T, there is an associated class-wide type T'Class. The set of values of T'Class is the discriminated union of the sets of values of T and all types derived directly or indirectly from T. Discrimination between the different specific types is with a type tag. This tag, associated with each value of a class-wide type, is the basis for run-time polymorphism in Ada 95. Note that ordinary types are referred to as specific types to distinguish them from class-wide types.
The associated class-wide type T'Class is "dynamic" in the sense of [Abadi 91]. The values of the class-wide type can be thought of as pairs consisting of
Such tag and value pairs are strongly typed, consistent with the philosophy of Ada. But only the class, and not necessarily the type within that class, will generally be known statically.
Class-wide types have no primitive operations of their own. However, explicit operations may be declared for such types, using T'Class as a subtype mark. Such operations are "class-wide" and can be applied to objects of any specific type within the class as well as to objects of the class-wide type or a descendent class-wide type.
Thus the following functions
function Size_In_Bytes(Any_File: File'Class) return Natural; function Get_File_From_User return File'Class;are class-wide operations and can be applied to all specific types of the class of types derived from the tagged type File. No dispatching is involved; the one same function is called whatever the tag of the actual parameter.
On the other hand, when a primitive operation of a tagged type is called with an operand of the class-wide type, the operation to be executed is selected at run time based on the type tag of the operand. As mentioned before, this run-time selection is called dispatching, so primitive operations of tagged types are called dispatching operations. Dispatching provides a natural form of run-time polymorphism within classes of related (derived) types. This variety of polymorphism is known as "inclusion polymorphism" [Cardelli 85].
+----------+---------------------------------+ | | formal | | actual | specific | class-wide | +----------+----------------+----------------+ | | | | | specific | static binding| class-wide op | | | | | |----------+----------------+----------------| | | | | |class-wide| dispatching | class-wide op | | | | | +----------+---------------------------------+ Table 4-1: Kinds of Binding
An operand used to control dispatching is called a controlling operand. A primitive operation may have several controlling operands; a primitive function may also have a controlling result. For a further discussion on controlling operands and results see 4.5.
The different kinds of binding corresponding to the various combinations of actual and formal parameters are summarized in Table 4-1.
The following example shows how a type File might be the basis for a class of types relating to the implementation of an Ada library
type File is tagged private; procedure View(F: File); -- display file F on screen type Directory is new File with private; procedure View(D: Directory); -- list directory D type Ada_File is new File with private; procedure View(A: Ada_File); -- open A with Ada sensitive editor type Ada_Library is new Directory with private; procedure View(L: Ada_Library); -- list library units of L and their status declare A_File: File'Class := Get_File_From_User; begin View(A_File); -- dispatches according to specific type of file end;
The above example presents a user-defined class of File types. The type File is tagged and hence the primitive operation View is dispatching. View is overridden for each type in the class in order to provide a unique behavior for each type of File. When View is called with a parameter that is of type File'Class, the tag will be used to determine the actual type within the class, and the call will dispatch to the View procedure for that type. On the other hand if View is called with a specific type then the choice of View procedure to be called is determined at compile time.
The hierarchy of types in the above example is illustrated in Figure 4-1.
File | | +-------------------+ | | Directory Ada_File | | | | Ada_Library Figure 4-1: The File Hierarchy
An earlier version of Ada 9X introduced class-wide types through the Class attribute for all derivation classes and not just those for tagged types. This was discarded since many reviewers felt that the added flexibility was unwise.
Note also that universal types (for numeric types) behave much as class-wide types although there are differences, see 3.3.
When building an abstraction that is to form the basis of a class of types, it is often convenient not to provide actual subprograms for the root type but just abstract subprograms which can be replaced when inherited. This is only allowed if the root type is declared as abstract; objects of an abstract type cannot exist. This technique enables common class-wide parts of a system to be written without being dependent on the properties of any specific type at all. Dispatching always works because it is known that there can never be any objects of the abstract type and so the abstract subprograms could never be called. This technique is illustrated in II.3.
A number of important practical criteria of concern to both existing and new users were taken into account when designing the object oriented facilities of Ada 95.
Legal Ada 83 programs should remain legal in Ada 95. Ideally, existing Abstract Data Types (ADTs) should be reusable with newly developed ones - the new facilities should not be so radically different from mechanisms of Ada 83 that existing ADTs must be rebuilt before being reused.
Tagged type extension and class-wide types are built upon the Ada 83 model of derived types. Their use is optional, and their presence in the language does not affect Ada 83 programs. Existing ADTs may be combined in some ways with new object oriented abstractions without modification. In other cases, it may be sufficient to add "tagged" to a type declaration, or to make other simple modifications such as changing an access type declaration to designate a class-wide type. Of course, in order to exploit these facilities to the full, it will be necessary to take them into account during the design process.
The solution should be conceptually consistent with existing Ada programming models. Intuitions about objects, types, subprograms, generic units, and so on should be preserved.
Ada 95 provides new capabilities in the context of a unified programming model: including types, operations and generic units. Class- wide programming generalizes the classes developed in Ada 83 to user- defined classes.
The solution should offer efficient performance for users of the facility with, ideally, no distributed overhead for non-users.
The introduction of tagged types, and a distinct class-wide type associated with each specific type as the mechanism for dispatch, makes run-time polymorphism optional to programmers (in contrast to languages like Smalltalk), in two senses.
The solution should be readily implementable within current compiler technology, and provide opportunities for optimizations.
Dispatching may be implemented as an indirect jump through a table of subprograms indexed by the primitive operations. This compares favorably with method look-up in many object oriented languages, and with the alternative of variant records and case statements, with their attendant variant checks, both in implementability and run-time efficiency.
We have seen that a record or private type marked as tagged may be extended on derivation with additional components. The run-time tag identifies information that allows class-wide operations on the class- wide type to allocate, copy, compare for equality, and perform any other primitive operations on objects of the class-wide type, in accordance with the requirements of the specific type identified by the tag.
The tag is thus important to the inner workings of type extension and class-wide types in Ada 95 and is brought to the fore by using the reserved word tagged in the declaration of the type. The concept of a tag is of course not new to programming languages but has a long precedent of use in Pascal (where it is used in the sense of discriminant in Ada) and is discussed by Hoare in [Dahl 72]. More recently the phrase type tag has been used by Wirth in connection with type extension [Wirth 88].
The reader might find it helpful to understand the concept of the tag and the dispatching rules by considering the implementation model alluded to at the end of the last section. We emphasize that this is just a possible model and does not imply that an implementation has to be done this way. In this model the tag is a pointer to a dispatch table. Each entry in the table points to the body of the subprogram for a primitive operation. Dispatching is performed as an indirect jump through the table using the primitive operation as an index into the table.
As an illustration consider the class of Alert types declared in II.1 in the package New_Alert_System. These types form a tree as illustrated in II.2. Recall that the root type Alert has primitive operations, Display, Handle and Log. These are inherited by Low_Alert without any changes. Medium_Alert inherits them from Alert but overrides Handle. High_Alert inherits from Medium_Alert and again overrides Handle and also adds Set_Alarm. (For simplicity, we will ignore other predefined operations which also have "slots" in the dispatch table; such as assignment, the equality operator and the application of the Size attribute.)
The tags for the various types are illustrated in Figure 4-2. A dispatching call, such as to Handle, is very cheaply implemented. The code simply jumps indirectly to the contents of the table indexed by the fixed offset corresponding to Handle (one word in this example). The base of the table is simply the value of the tag and this is part of the value of the class-wide object. Note moreover that the dispatch table does not contain any class-wide operations (such as Process_Alerts in II.2) since these are not dispatching operations.
In addition to being used as formal parameters to class-wide operations, class-wide types may also be used as the designated type for an access type, and as the type of a declared object. Access types designating a class-wide type are very important, since they allow the creation of heterogeneous linked data structures, such as trees and queues.
+---------------+ +----------+ | Alert'Tag | --> | Display | --> Display of Alert +---------------+ |----------| | Handle | --> Handle of Alert |----------| | Log | --> Log of Alert +----------+ +---------------+ +----------+ | Low_Alert'Tag | --> | Display | --> Display of Alert +---------------+ |----------| | Handle | --> Handle of Alert |----------| | Log | --> Log of Alert +----------+ +----------------+ +----------+ |Medium_Alert'Tag| --> | Display | --> Display of Alert +----------------+ |----------| | Handle | --> Handle of Medium_Alert |----------| | Log | --> Log of Alert +----------+ +---------------+ +----------+ |High_Alert'Tag | --> | Display | --> Display of Alert +---------------+ |-----------| | Handle | --> Handle of High_Alert |-----------| | Log | --> Log of Alert |-----------| | Set_Alarm | --> Set_Alarm of High_Alert +----------+ Figure 4-2: Tags and Dispatch Tables
Declared objects of a class-wide type are not as frequently used as are formal parameters and heap objects, but they are useful as intermediates in larger computations. However, because there is no upper bound on the size of types in a class, a declared object of a class-wide type must be explicitly initialized. This determines the size, the tag, and any discriminants for the object, and thereafter neither the tag nor the discriminants may be changed. Of course, it is necessary for all class-wide objects to have a tag so that dispatching works without any unnecessary tests. We have chosen to specify the tag by requiring an explicit initial value.
This indirectly provides a capability somewhat akin to declaration by association using like in Eiffel [Meyer 88]. We can thereby ensure, for example, that a locally declared class-wide object has the same tag as an actual parameter.
Note that discriminants of tagged types are not permitted to have defaults; this would have increased the complexity of the language to no great benefit since the tag of an object (specific and class-wide) cannot be changed and the tag is treated as a (hidden) discriminant. It would be inconsistent to allow discriminants to be changed but not tags.
If assignment were allowed to change the tag or the discriminants, then the size of the class-wide object might have to grow, requiring a deallocation and reallocation as part of assignment. We have avoided introducing operations in Ada 95 that involve this kind of implicit dynamic allocation at run-time. Therefore, an explicit access value with explicit deallocation and reallocation is required if a programmer desires to have the equivalent of an unconstrained object of a class-wide type.
Note that Ada 83 required a similar approach for handling unconstrained arrays and unconstrained discriminated types without defaults for the discriminants. In general, the way unconstrained composite types and their associated bounds or discriminants were handled in Ada 83 is a good model for how class-wide types and their associated type tags are handled in Ada 95.
The predefined equality operators and the membership tests are generalized to apply to class-wide types. Like other predefined operations on such types, the implementation will depend on the particular specific type of the operands. Unlike normal dispatching operations, however, Constraint_Error is not raised if the tags of the operands do not match.
For equality, tag mismatch is treated as inequality. Only if the tags match is a dispatch then performed to the type-specific equality checking operation. This approach allows a program to safely compare two values of a class-wide tagged type for equality, without first checking that their tags match. The fact that no exception is raised in such an equality check is consistent with the other predefined relational operators, as noted in [RM83 4.5.2(12)].
For a membership test such as X in S, where X is of a class-wide type, the tag of the value of the simple expression X is checked to see whether it belongs to the subtype mark S. If the subtype mark S identifies a class-wide type, then the membership test determines whether the tag of the value identifies a specific type covered by the class-wide type. If the subtype mark S identifies a specific tagged type, then the membership test determines whether the tag of the value equals the tag of that type. In any case, to be considered a member, the value must satisfy any constraints associated with the subtype mark.
The Tag attribute is defined for querying the tag of a specific type, or of an object of a class-wide type. This allows two class-wide objects to be checked to see whether they have the same tag. It is also possible to compare the tag of a class-wide object with the tag of a specific type; such a comparison is equivalent to a membership test.
Thus (using the alert example from Part One), the test
AC in Medium_Alertis identical to
AC'Tag = Medium_Alert'Tagbut note that the test
AC in Medium_Alert'Classhas no generally applicable equivalent in terms of explicit user checks on tags because we cannot talk about possible future extensions in terms of tags. It is thus preferable to use membership tests rather than explicit testing of tags in order to ensure that our program is extensible.
The rules for membership tests on class-wide types are constructed so that certain simple type-specific behavior may be performed in a class- wide operation, without the need to declare and define a new primitive operation on all types within the class.
For example, given
type Expression_Node is tagged... type Binary_Operator is new Expression_Node with ... type Node_Ptr is access Expression_Node'Class;one could define the following operation Display on the access to class- wide type Node_Ptr
procedure Display(Expr: Node_Ptr; Prec: Positive := 1) is -- display expr, parenthesized if necessary begin if Expr.all in Binary_Operator'Class then -- handle the binary operator subclass declare Binop: constant Bin_Op_Ptr := Bin_Op_Ptr(Expr); -- convert parameter to ptr to Binary_Operator -- to gain access to its subclass operations begin if Precedence(Binop) < Prec then -- parenthesize if lower precedence Put('('); end if; -- display left, op, right, passing down precedence Display(Binop.Left, Precedence(Binop)); Put(Symbol(Binop)); Display(Binop.Right, Precedence(Binop)); if Precedence(Binop) < Prec then -- closing parenthesis if necessary Put(')'); end if; end; else -- handle the other kinds of expressions ... end if; end Display;
An alternative, more "object-oriented" approach would be to define a separate Display primitive operation for each distinct type within the class. See for example [Taft 93].
We conclude this section by discussing a number of important general principles regarding primitive operations and dispatching. It is instructive to map these principles into the implementation model of the tag and dispatch table mentioned above; but remember that this is only a possible model although a very natural one. We can refer to the entries in the dispatch table as "slots".
The first general principle is that dispatching always works without any checking at runtime; in other words that the subprogram referred to by the dispatch table for the tag value can always be safely called. A number of individual rules ensure that this is true. Perhaps the most important is that operations cannot be removed when deriving a new type; they can only be added or replaced. This means that if an operation is primitive for a type then it is necessarily available for all (nonabstract) types in the class rooted at that type. Another vital rule is that we cannot create an object of an abstract type; this prevents dispatching to an abstract subprogram (see 3.6.2). Moreover, as discussed further in 4.5, the tag of an object can never be changed, so the tag of a declared object cannot be changed into the tag corresponding to a type without the appropriate operations.
Another important rule is that type extension is not allowed at a place which is not accessible from the parent type such as within an inner block. This rule ensures that the accessibility of all specific types in a (tagged) class is the same and prevents a value from being assigned to a class wide object and thereby outlive its specific type. A further consequence is that we cannot dispatch to a subprogram which is at an inner level and which might thereby attempt to access non-existent data. Consider
package Outer is type T is tagged ...; procedure P(Object: T); -- a dispatching operation type A is access T'Class; Global: A; end Outer; procedure Dodgy is package Inner is type NT is new T with ...; -- an illegal extension procedure P(Object: NT); -- override end; package body Inner is I: Integer := 0; procedure P(Object: NT) is begin I := I + 1; -- assign to variable local to Inner end P; end Inner; begin Global := new Inner.NT'( ...); end Dodgy; procedure Disaster is begin Dodgy; P(Global.all); -- dispatch to non-existent P end Disaster;
The procedure Dodgy attempts to declare the type NT and then assign an access to an object of the specific type to the class wide access variable Global. If this were allowed then the call of P in the procedure Disaster would attempt to dispatch to the procedure inside Inner and thereby access the variable I which no longer exists. Disallowing extensions at an inner level prevents this sort of difficulty.
Note also that having all the types at the same accessibility level ensures that the "subprogram values" in the dispatch table can be implemented just as simple addresses; no level information is required. There is an analogy with access to subprogram values discussed in 3.7.2.
Another important principle is that the dispatch table is the same for all views of a type; in other words there is just one dispatch table common to both a partial view and a full view. However, it can be the case that some operations are not visible from a partial view. This is discussed further in 7.1.1.
Interestingly, it is also possible to have two operations of the same name (and profile), one visible from one view and the other from another view in such a way that they are never both visible from the same view; in this case they would occupy different slots in the dispatch table. These and related possibilities are also illustrated in detail in 7.1.1.
The freezing rules have an important impact on type extension. The basic idea is that a record extension freezes the parent; the key impact is that further primitive operations cannot then be declared for the parent. However, a private extension does not freeze the parent; freezing is postponed until the later full declaration. See 13.5.1.
Finally, we summarize the rules regarding which operations are primitive. The main rule is that only those operations with an operand or result of the type and declared immediately in the package specification with the type declaration (or type extension) are primitive operations. (This general rule applies to both tagged and other types.) Note that if a type is not declared in a package specification then any operations declared in the same declarative region are not primitive and thus not inherited. Because this might give rise to surprises, especially in the case of tagged types, it is in fact forbidden to call a nonprimitive operation in a dispatching way (that is with a class-wide actual); this eliminates the risk of accidentally declaring a tagged type and then finding that what were presumed to be primitive operations do not dispatch.
Note moreover that, in the case of a type extension, although new primitive operations cannot be added except in a package specification, primitive operations inherited from the parent may be overridden wherever the extension is declared and these overridden versions will of course be inherited by any further extension. Thus new slots can only be created by a type declared or extended in a package specification, but existing slots may be overridden wherever a type extension is declared. Consider
package P is type T is tagged ...; procedure Op1(X: T); -- primitive of T end P; with P; use P; package Q is type NTQ is new T with ...; procedure Op1(X: NTQ); -- overrides inherited Op1 from T procedure Op2(X: NTQ); -- additional primitive of NTQ end Q; package body P is type NTP is new T with ...; procedure Op1(X: NTP); -- overrides inherited Op1 from T procedure Op2(X: NTP); -- not a primitive of NTP end P;
The type NTQ is declared immediately inside the specification of package Q and thus the operation Op2 is primitive. On the other hand NTP is declared in the body of package P and thus although Op1 overrides the inherited Op1, nevertheless the operation Op2 is not primitive.
These rules are designed to give flexibility with minimum burden. Many type extensions will simply replace existing operations rather than add new ones and it seems a heavy burden to insist that these be in a package specification. Indeed, in the case of the leaves of the tree of types, there is no need to add further primitive operations (if a type is a leaf then any new operation is not inherited by another type and thus there is no need to dispatch); but it is important to be able to override existing operations wherever the type is declared. See the example in 4.4.4.
A minor difference between tagged and nontagged types concerns the parameter modes of overriding operations. In the case of tagged types an overriding operation must have the same parameter modes otherwise dispatching would not work. In the case of nontagged types this does not matter and for compatibility with Ada 83, the modes need not be the same; note that overload resolution ignores parameter modes.
This section presents some of the ways in which Ada 95's object oriented programming features may be used and combined with other facilities to address a number of programming paradigms.
An important use of object oriented programming is variant programming. This was amply illustrated by the example of processing alerts in Part One. As we saw, the use of variant records can be both cumbersome and error prone [Wirth 88] whereas the use of type extension is both more flexible and entirely secure.
In this section we give other typical paradigms of use
In dealing with the alert example in II.2 we mentioned that the various alerts might be held on a queue ready for processing. Such a queue must have the capability to be heterogeneous because the alerts are of different specific types. This is a common requirement and it is therefore appropriate to develop a package that can be reused for a variety of applications.
However, the strong typing model of Ada 83 made it very difficult to write a common abstraction that could be reused without alteration even through the use of generics. (Only homogeneous structures could be constructed with Ada 83 generic units. Variant records could be used to provide some heterogeneity, but source code changes and possibly extensive recompilation were required to add new variants.)
There are several approaches that can be taken which have a different balance between convenience and efficiency. We will explore a number of these in order to illustrate various considerations and potential pitfalls to be avoided. We will start at the convenient end of the spectrum by considering a package which is generic with respect to the type of data on the queue. The specification might be
generic type Q_Data(<>) is private; package Generic_Queues is type Queue is limited private; function Is_Empty(Q: Queue) return Boolean; procedure Add_To_Queue(Q: access Queue; X: in Q_Data); function Remove_From_Queue(Q: access Queue) return Q_Data; Queue_Empty: exception; private ... end Generic_Queues;
It is important to note that the formal type has an unknown discriminant part. It can then be matched by a specific type or by a class wide type (see 12.5). If we use a specific type then of course the queue is homogeneous but using a class wide type provides a heterogeneous queue. Note also that the exported type Queue is limited private; the implementation will inevitably be in terms of pointers to a chained list and making it limited prevents the user from making a copy which might subsequently become nonsense; we will return to the implementation details in a moment.
Values are added to the queue by calling the procedure Add_To_Queue and removed by calling the function Remove_From_Queue. Making the latter a procedure with profile
procedure Remove_From_Queue(Q: access Queue; X: out Q_Data);is rather restrictive because we cannot call the procedure with an uninitialized class-wide object (they are not allowed) and an initialized one will be constrained by its initial value. Such a procedure is therefore only useful if we always know (by some other means) the anticipated specific type of the item being removed. Using a function works because the returned result provides the initial value and thus the constraint.
Incidentally we made the parameter Q of the function an access parameter largely because an in out parameter is not allowed for functions. We could have made it an in parameter but the internal implementation of the queue would then need an extra level of indirection. See 6.1.2 for a fuller discussion on the merits of access versus in out parameters. We also have to choose between declaring a queue directly and making it aliased or creating the queue with an allocator. We choose the latter.
So for the alerts, we can write
package Alert_Queues is new Generic_Queues(Q_Data => Alert'Class); use Alert_Queues; type Queue_Ptr is access all Queue; The_Queue: Queue_Ptr := new Queue; ... MA: Medium_Alert := ...; ... Add_To_Queue(The_Queue, MA);and a value could be retrieved by
Any_Alert: Alert'Class := Remove_From_Queue(The_Queue);where the result provides the constraint for Any_Alert.
Returning to the example in II.2, we could then call the first form of Process_Alerts by
Process_Alerts(Any_Alert);and indeed we could directly write
It is often preferable to manipulate access values to tagged types rather than tagged type values themselves; partly because this avoids the cost of copying and perhaps more important it overcomes the problem of not knowing the size of the object in the case of a class wide type. So an alternative approach would be to write
type Alert_Ptr is access all Alert'Class; package Alert_Ptr_Queues is new Generic_Queues(Alert_Ptr); use Alert_Ptr_Queues; type Queue_Ptr is access all Queue; The_Queue: Queue_Ptr := new Queue; ... New_Alert: Alert_Ptr := new Medium_Alert'(...); ... Add_To_Queue(The_Queue, New_Alert);and then in the body of the second form of Process_Alerts we could have
Next_Alert: Alert_Ptr := Remove_From_Queue(The_Queue); ... Handle(Next_Alert.all);
This second formulation is very straightforward since the queue is really homogeneous; all the elements are of the same access type and the heterogeneity comes from the nature of the accessed type.
We now return to consider how the generic package might be implemented. An important point is that since the formal type is indefinite, we cannot declare an uninitialized object of the type or a record with a component of the type. This forces us to use dynamic storage. As a first attempt the private part might be
private type Data_Ptr is access Q_Data; type Node; type Node_Ptr is access Node; type Node is record D: Data_Ptr; Next: Node_Ptr; end record; type Queue is record Head: Node_Ptr; Tail: Node_Ptr; end record; end Generic_Queues;
This is an obvious approach although slightly cumbersome because of the double levels of indirection. This causes a double allocation whenever a new data item is added; one for the node and one for the data itself. Care is also needed in discarding storage when an item is removed. The details are left to the reader.
A problem with the above approach is the encapsulation of the storage management. Although the generic is very reusable it is somewhat costly because of the storage allocation overheads. Of course if the queue were homogeneous and had a definite parameter without <> then it would be simpler because the values could be stored directly; we are paying for the generality. Insisting that the parameter be definite would not be unreasonable because, as shown above, the client can always pass an access type.
A completely different approach is to arrange things so that the user's type provides the storage for the linking mechanism through type extension; this avoids the overheads of storage management but requires a little more effort on the part of the user. Consider the following
package Queues is type Queue is limited private; type Queue_Element is abstract tagged private; type Element_Ptr is access all Queue_Element'Class; function Is_Empty(Q: Queue) return Boolean; procedure Add_To_Queue(Q: access Queue; E: in Element_Ptr); function Remove_From_Queue(Q: access Queue) return Element_Ptr; Queue_Error: exception; private type Queue_Element is tagged record Next: Element_Ptr := null; end record; type Queue is limited record Head: Element_Ptr := null; Tail: Element_Ptr := null; end record; end Queues;
The general idea is that the user extends the type Queue_Element with the data to be queued. The linking is then done through the private component Next of which the user is not aware. The body might be as follows
package body Queues is function Is_Empty(Q: Queue) return Boolean is begin return Q.Head = null; end Is_Empty; procedure Add_To_Queue(Q: access Queue; E: in Element_Ptr) is begin if E.Next /= null then raise Queue_Error: -- already on a queue end if; if Q.Head = null then -- list was empty Q.Head := E; Q.Tail := E; else Q.Tail.Next := E; Q.Tail := E; end if; end Add_To_Queue; function Remove_From_Queue(Q: access Queue) return Element_Ptr is Result: Element_Ptr; begin if Is_Empty(Q) then raise Queue_Error; end if; Result := Q.Head; Q.Head := Result.Next; Result.Next := null; return Result; end Remove_From_Queue; end Queues;
Heterogeneous queues can be made because the type Element_Ptr is an access to class wide type. There are a number of ways in which this approach can be used which we will now explore using the alert example.
The first point is that we cannot extend the queue element with a class wide type and so we cannot just make a single extension which directly contains any alert. We could of course just extend with a component of the type Alert_Ptr and then add and remove alerts as follows
type Alert_Element is new Queue_Element with record The_Ptr: Alert_Ptr; end record; ... type Queue_Ptr is access all Queue; The_Queue: Queue_Ptr := new Queue; ... New_Alert: Alert_Ptr := new Medium_Alert'(...); New_Element: Element_Ptr := new Alert_Element'(Queue_Element with New_Alert); Add_To_Queue(The_Queue, New_Element); ... Next_Alert := Alert_Element(Remove_From_Queue(The_Queue)).The_Ptr;
Note the use of the extension aggregate with the subtype name as the ancestor part, see 3.6.1.
We could create distinct element types for each alert level although this has its own problems as will soon become apparent. If we write
type Low_Element is new Queue_Element with record LA: Low_Alert; end record; type Medium_Element is new Queue_Element with record MA: Medium_Alert; end record; ...then adding alerts to the queue is relatively straightforward.
MA: Medium_Alert := ...; New_Element: Element_Ptr := new Medium_Element'(Queue_Element with MA); Add_To_Queue(The_Queue, New_Element);
Removing an alert in this formulation is less straightforward since we have to identify its specific type by interrogating the tag thus
Next_Element: Element_Ptr := Remove_From_Queue(The_Queue); ... if Next_Element'Tag = Low_Element'Tag then Process_Alerts(Low_Element(Next_Element).LA);
Unfortunately this brings us back to variant programming which we try to avoid. The essence of the difficulty is that we have dispersed the alerts into the different queue elements and lost their commonality. There are two possible different approaches. The best is to plan ahead and ensure that the complete alert hierarchy is developed with the common queue element already in place. Following II.3, we can write
with Queues; use Queues; package Base_Alert_System is type Alert is abstract new Queue_Element with null record; procedure Handle(A: in out Alert) is abstract; end Base_Alert_System;and then we develop all the rest of the alert structure as before. Now all alerts themselves have the linking mechanism already in them and can be directly placed on a queue. So we can now simply write
New_Alert: Alert_Ptr := new Medium_Alert'(...); Add_To_Queue(Queue, New_Alert); ... Next_Alert := Alert_Ptr(Remove_From_Queue(The_Queue));
Note that we have to convert the result to the type Alert_Ptr. This conversion requires a runtime check which always passes (because we have only placed alerts on the queue).
An important point to note with this approach is that each element can be on only one queue at a time. An attempt to place an element on a second queue will result in Queue_Error. Note that when an element is removed from a queue, its Next component is set to null so that it can then be placed on another queue. Observe that if we consider the elements as like real objects then they can only be in one place at a time and hence only on one queue at a time; so the restriction should not be unrealistic.
If it is quite impossible to modify an existing hierarchy to incorporate the link in the root (perhaps because we do not have the source), then it is still possible to avoid the variant difficulty when removing elements from the queue. The idea is to add a dispatching operation which can extract the particular alert; we can write
with Queues; use Queues; package Alert_Elements is type Data_Element is abstract new Queue_Element with null record; type Data_Element_Ptr is access all Data_Element'Class; function Extract(D: Data_Element) return Alert'Class is abstract; end Alert_Elements;
By introducing the type Data_Element we provide a place to attach the required dispatching operation. Note of course that Extract only applies to the class rooted at Data_Element and not the class rooted at Queue_Element.
We can now declare the various types such as Low_Element for each alert type as extensions of Data_Element and provide an appropriate function Extract for each such as
type Low_Element is new Data_Element with record LA: Low_Alert; end record; function Extract(D: access Low_Element) return Alert'Class is begin return D.LA; end Extract;
We can add alerts to the queue much as before but removing alerts is now much simpler. Having copied the pointer to the removed element into Next_Element we can then convert to the type Data_Element and then call Extract thus
Next_Element: Element_Ptr := Remove_From_Queue(The_Queue); Any_Alert: Alert'Class := Extract(Data_Element_Ptr(Next_Element));so that dispatching to the appropriate function Extract occurs thereby overcoming the need for variant programming.
Although this mechanism works, it is vulnerable to error if the alert structure is extended. There is a risk that the corresponding extension to the element structure might be forgotten in which case a value of an extended type will not be extracted properly.
We continue this rather long discussion by considering how the original generic queue package could be implemented in terms of the second package. The private part and body might be
private type Data_Ptr is access Q_Data; type Q_Element is new Queues.Queue_Element with record D: Data_Ptr; end record; type Queue is new Queues.Queue; end Generic_Queues; package body Generic_Queues is function Is_Empty(Q: Queue) return Boolean is begin return Queues.Is_Empty(Queues.Queue(Q)); end Is_Empty; procedure Add_To_Queue(Q: access Queue; X: in Q_Data) is begin Queues.Add_To_Queue(Queues.Queue(Q), new Q_Element'(Queues.Queue_Element with new Q_Data'(X))); end Add_To_Queue; function Remove_From_Queue(Q: access Queue) return Q_Data is begin if Is_Empty(Q) then raise Queue_Empty; end if; declare Q_E_P: Queues.Element_Ptr := Queues.Remove_From_Queue(Queues.Queue(Q)); D_P: Data_Ptr := Q_Element(Q_E_P.all).D; Result: Q.Data := D_P.all; begin -- can now discard storage occupied by the queue element -- and the data; assuming suitable unchecked conversions Free(Q_E_P); Free(D_P); return Result; end; end Remove_From_Queue; end Generic_Queues;
Note that we have to take care not to lose access to the storage so that it can be freed. In particular the result is copied into a local variable; this is allowed despite the type being indefinite because the variable is initialized. Another point is that Is_Empty, Add_To_Queue and Remove_From_Queue can be slightly simplified since Queue is derived from Queues.Queue and therefore inherits subprograms with the same identifiers (although different profiles). For example we could simply write
procedure Add_To_Queue(Q: access Queue; X: in Q_Data) is begin Add_To_Queue(Q, new Q_Element'(Queues.Queue_Element with new Q_Data'(X))); end Add_To_Queue;
The implementation of the generic queue package involves much copying of the data; nevertheless it provides a clean interface and hides all the problems. However, the lower level package is almost as easy to use if the data is structured correctly. Intermediate designs are also possible; for example a generic package that accepts any definite type. The two subprograms could then both be procedures with in out parameters and less indirection would be required.
We conclude with some general observations. It is much easier to manipulate access values when dealing with class wide data. This is largely because of the difficulties of storing such data. We also note that object oriented programming requires thought especially if variant programming is to be avoided. There is a general difficulty in finding out what is coming which is particularly obvious with input-output; it is easy to write dispatching output operations but generally impossible for input.
For the next example we consider doubly-linked lists which are a common programming technique.
The implementation shown below uses tagged types and somewhat similar techniques to the second queue package in the last section although at a lower level of abstraction.
package Doubly_Linked is type Node_Type is tagged limited private; type Node_Ptr is access all Node_Type'Class; -- define add/remove operations, -- assuming head of list is a single Node_Ptr procedure Add(Item: Node_Ptr; Head: in out Node_Ptr); -- add new node at head of list procedure Remove(Item: Node_Ptr; Head: in out Node_Ptr); -- remove node from list, update Head if necessary -- define functions to iterate forward or backward over list function Next(Item: Node_Ptr) return Node_Ptr; function Prev(Item: Node_Ptr) return Node_Ptr; private type Node_Type is tagged limited record Prev: Node_Ptr := null; Next: Node_Ptr := null; -- other components to be added by extension end record; end Doubly_Linked;
This illustrates the specification of a simple doubly linked list abstraction that may be extended with additional components and operations to create useful heterogeneous linked lists. It is similar to the second queue example in that the user extends the type Node_Type to contain the required data and it allows heterogeneous lists because the type Node_Ptr is an access to class wide type and thus allows the various nodes of different specific types to be linked together.
A difference is that the user refers to the list through the parameter Head which is also of the type Node_Ptr. Being doubly linked there is no need to separately maintain a reference to the tail of the list. And indeed it is possible to create variations which deal with circular lists.
The procedure Add places a new item at the start of the list but in contrast to the queue example, the procedure Remove takes the given item from wherever it is in the list. The procedures Next and Prev enable the user to move over the list as required.
The details of the implementation are not shown but should ensure correct behavior when dealing with an empty list and should also guard against adding an item which is already on the list (or another list) or removing something not on the list.
We can now use the Doubly_Linked abstraction to demonstrate programming by extension. We implement a keyed association abstraction using an extension of Doubly_Linked.Node_Type. The generic package Association takes a Key_Type, an equality operation defined on the Key_Type and a hash function defined on the Key_Type. The exported type Element_Type is intended to be further extended with the data to be associated with the key.
with Doubly_Linked; generic type Key_Type is limited private; with function "="(Left, Right: Key_Type) return Boolean is <>; with function Hash(Key: Key_Type) return Integer is <>; package Association is type Element_Type is new Doubly_Linked.Node_Type with record Key: Key_Type; end record; type Element_Ptr is new Doubly_Linked.Node_Ptr; function Key(E: Element_Ptr) return Key_Type; type Association_Table(Size: Positive) is limited private; -- size determines size of hash table procedure Enter(Table : in out Association_Table; Element: in Element_Ptr); function Lookup(Table: in Association_Table; Key : in Key_Type) return Element_Ptr; -- other operations on Association_Table (eg, an iterator)... private type Element_Ptr_Array is array (Integer range <>) of Element_Ptr; type Association_Table(Size: Positive) is record Buckets: Element_Ptr_Array(1 .. Size); end record; end Association;
An Association_Table is a hash table, where each hash value has an associated doubly-linked list of elements. The elements may be of any type derived from Element_Type. The head of each list is of the type Element_Ptr which is itself derived from Node_Ptr (an untagged derived type). All the primitive operations (Add, Remove etc) which apply to Node_Ptr are thus inherited by Element_Ptr. The function Key returns the key component of the object referred to as parameter.
We can now go on to define a symbol table for a simple language with types, objects, and functions using the association structure. The symbol table allows different types of entries for each of types, objects and functions.
with Association; package Symbol_Table_Pkg is type Identifier is access String; -- symbol table key is pointer to string -- allowing arbitrary length identifiers function Equal(Left, Right: Identifier) return Boolean; function Hash(Key: Identifier) return Integer; -- instantiate Association to produce symbol table package Symbol_Association is new Association(Identifier, Equal, Hash); subtype Symbol_Table is Symbol_Association.Association_Table; -- define the three kinds of symbol table elements -- using type extension type Type_Symbol is new Symbol_Association.Element_Type with record Category: Type_Category; Size : Natural; end record; type Type_Ptr is access Type_Symbol; type Object_Symbol is new Symbol_Association.Element_Type with record Object_Type : Type_Ptr; Stack_Offset: Integer; end record; type Function_Symbol is new Symbol_Association.Element_Type with record Return_Type : Type_Ptr; Formals : Symbol_Table(5); -- very small hash table Locals : Symbol_Table(19); -- bigger hash table Function_Body: Statement_List; end record; end Symbol_Table_Pkg;
A type Symbol_Table is produced by instantiating the generic Association with a key that is a pointer to a string. Then three extensions of Element_Type are declared, each of which may be entered into the symbol table. An interesting point is that the elements for the type Function_Symbol each themselves contain internal symbol tables.
The body of the generic Association package might be as follows
package body Association is procedure Enter(Table: in out Association_Table; Element: Element_Ptr) is -- enter new element into association table. Hash_Index: constant Integer := (Hash(Element.Key) mod Table.Size) + 1; use Doubly_Linked; begin -- add to linked list of appropriate bucket Add(Element, Table.Buckets(Hash_Index)); end Enter; function Key(E: Element_Ptr) return Key_Type is begin return Element_Type(E.all).Key; end Key; function Lookup(Table: Association_Table; Key: Key_Type) return Element_Ptr is -- look up element in association table. Hash_Index: constant Integer := (Hash(Key) mod Table.Size) + 1; Ptr: Element_Ptr := Table.Buckets(Hash_Index); -- head of list use Doubly_Linked; begin -- Scan doubly-linked list for element with -- matching key. Return null if none found. while Ptr /= null loop if Key(Ptr).Key = Key then return Ptr; -- matching element found and returned end if; Ptr := Next(Ptr); end loop; return null; -- no matching element found end Lookup; end Association;
The operations Enter and Lookup are implemented in a straightforward manner using the operations of the type Element_Ptr inherited from Node_Ptr.
The function Key is interesting. Note first that since Element_Ptr is derived from Node_Ptr its accessed type is also Node_Type'Class (this is a nontagged derivation and when we derive from an access type the accessed type of the derived type is the same as its parent as in Ada 83). So the expression E.all is of the type Node_Type'Class. It is then converted to the specific type Element_Type (this is away from the root and so involves a run-time check which will always succeed in this example) and the component is then selected.
Note that since the type Node_Ptr is visible we could declare an object directly and pass an access to it as parameter to the function Key; this would raise Constraint_Error because the function Key is designed to operate on elements and not on nodes in general. We could overcome this by making the types Element_Type and Element_Ptr private so that the underlying relationship to the type Node_Type is hidden.
A very important aspect of object oriented programming is the ability to provide different implementations of the one abstraction. One can do this to some extent in Ada 83 in that one package could have alternate bodies. But only one implementation can be used in one program.
It is worth noting that the possibility of multiple implementations of an abstraction has been recognized for some time [Guttag 77]. However, when abstraction facilities were incorporated into conventional compiled languages, a single implementation per interface was typically adopted for pragmatic reasons [Dijkstra 72]. This is illustrated by CLU [Liskov 77] and Modula [Wirth 77] as well as Ada 83. It was really C++ [Stroustrup 91] that was the first main-stream systems programming language that recognized that the dynamic binding inherent in having objects identify their own implementation could be provided while preserving performance.
Thus, with a true object oriented language, the common structure of the types and their operations provided by inheritance enable different types to be treated as different realizations of a common abstraction. The tag of an object indicates its implementation and allows a dynamic binding between the client and the appropriate implementation.
We can thus develop different implementations of a single abstraction, such as a family of list types [LaLonde 89], matrices (dense or sparse), or set types, as in the next example.
The specification of an Abstract_Sets package might be
-- Given subtype Set_Element is Natural; package Abstract_Sets is type Set is abstract tagged private; -- empty set function Empty return Set is abstract; -- build set with 1 element function Unit(Element: Set_Element) return Set is abstract; -- union of two sets function Union(Left, Right: Set) return Set is abstract; -- intersection of two sets function Intersection(Left, Right: Set) return Set is abstract; -- remove an element from a set procedure Take(From: in out Set; Element: out Set_Element) is abstract; Element_Too_Large: exception; private type Set is abstract tagged null record; end Abstract_Sets;
The package provides an abstract specification of sets. The Set type definition is an abstract tagged private type, whose full type declaration is a null record. It defines a set of primitive operations on Set that are abstract subprograms. Abstract subprograms do not have bodies and cannot be called directly. However, as primitive operations, they are inherited. Derivatives of Set must override these abstract operations to provide their own implementations. Derivatives of Set can extend the root type with components providing the desired data representation, and can then implement the primitive operations for that representation.
As an example, one might build an implementation using bit vectors
with Abstract_Sets; package Bit_Vector_Sets is type Bit_Set is new Abstract_Sets.Set with private; -- Override the abstract operations function Empty return Bit_Set; function Unit(Element: Set_Element) return Bit_Set; function Union(Left, Right: Bit_Set) return Bit_Set; function Intersection(Left, Right: Bit_Set) return Bit_Set; procedure Take(From: in out Bit_Set; Element: out Set_Element); private Bit_Set_Size: constant := 64; type Bit_Vector is array (Set_Element range 0 .. Bit_Set_Size-1) of Boolean; pragma Pack(Bit_Vector); type Bit_Set is new Abstract_Sets.Set with record Data: Bit_Vector; end record; end Bit_Vector_Sets; package body Bit_Vector_Sets is function Empty return Bit_Set is begin return (Data => (others => False)); end; function Unit(Element: Set_Element) return Bit_Set is S: Bit_Set := Empty; begin S.Data(Element) := True; return S; end; function Union(Left, Right: Bit_Set) return Bit_Set is begin return (Data => Left.Data or Right.Data); end; ... end Bit_Vector_Sets;
An alternative implementation more appropriate to very sparse sets might be based on using linked records containing the elements present in a set. We could then write a program which contained both forms of sets; we could convert from one representation to any other by using
procedure Convert(From: in Set'Class; To: out Set'Class) is Temp: Set'Class := From; Elem: Set_Element; begin -- build up target set, one element at a time To := Empty; while Temp /= Empty loop Take(Temp, Elem); To := Union(To, Unit(Elem)); end loop; end Convert;
This procedure dispatches onto the appropriate operations according to the specific type of its parameters. Remember that all variables of class-wide types (such as Temp) have to be initialized since class-wide subtypes are indefinite and the tag is given by the tag of the initial value. Note that the equality operators are also dispatching operations so that the expression Temp /= Empty uses the equality operation for the type of From. Furthermore, assignment is also a dispatching operation although this is not often apparent. In this example, however, if the type of From were a linked list then a deep copy would be required otherwise the original value could be damaged when the copy is decomposed. Such a deep copy can be performed by using a controlled type for the inner implementation of the list as explained in 7.4.
Finally, note that the abstract sets package could have been generic
generic type Set_Element is private; package Abstract_Sets is ...and this would have added an extra dimension for the possibility of reuse.
It is a common requirement to wish to apply some operation over all members of a set. One approach was discussed in 3.7.1 using access discriminants. In this section we show a rather different technique using type extension and dispatching. (We start by assuming the example is not generic and consider the impact of genericity later.)
type Element is ... package Sets is type Set is limited private; ... -- various set operations type Iterator is abstract tagged null record; procedure Iterate(S: Set; IC: Iterator'Class); procedure Action(E: in out Element; I: in out Iterator) is abstract; private type Node; type Ptr is access Node; type Node is record E: Element; Next: Ptr; end record; type Set is new Ptr; -- implement as singly-linked list end Sets; package body Sets is ... -- bodies of the various set operations procedure Iterate(S: Set; IC: Iterator'Class) is This: Ptr := Ptr(S); begin while This /= null loop Action(This.E, IC); -- dispatch This := This.Next; end loop; end Iterate: end Sets;
This introduces an abstract type Iterator which has a primitive subprogram Action. The procedure Iterate loops over the set and calls by dispatching the procedure Action corresponding to the specific type of the object of the Iterator class. The main purpose of the Iterator type therefore is to identify by dispatching the particular Action to be performed.
The simple example of counting the number of elements in a set can now be written as follows.
package Sets.Stuff is function Count(S: Set) return Natural; end Sets.Stuff; package body Sets.Stuff is type Count_Iterator is new Iterator with record Result: Natural := 0; end record; procedure Action(E: in out Element; I: in out Count_Iterator) is begin I.Result := I.Result + 1; end Action; function Count(S: Set) return Natural is I: Count_Iterator; begin Iterate(S, I); return I.Result; end Count; end Sets.Stuff;
The type Count_Iterator is an extension of the abstract type Iterator and the specific procedure Action does the counting. The result is accumulated in a component of the type Count_Iterator and is thereby made accessible to the procedure Action; this component is initialized to zero when the Count_Iterator is declared inside the function Count.
Observe that the type extension is not immediately within a package specification and so it is not possible to add new primitive operations to it. Nevertheless it is possible to override inherited operations such as Action as explained in 4.3. If, for some reason, we wanted to declare additional primitive operations then we would have to introduce an internal package. Note also that we cannot put the type extension inside the function Count because this would break the accessibility rules by making the type extension at a deeper level than the parent type as explained in 3.4.
A further point is that if the parent package Sets were generic with the type Element being a formal parameter as in the example with access discriminants in 3.7.1, then the child package Sets.Stuff would also have to be generic. In that case it would be necessary to move the type extension and the overriding operation Action into the private part of Sets.Stuff for reasons explained in 12.5. More general actions can be written in a similar manner. Any parameters or results for the action are passed as components in the iterator type. A general procedure to perform some action might be
procedure General(S: Set; P: Parameters) is I: General_Iterator; begin ... -- copy parameters into iterator Iterate(S, I); ... -- copy any results from iterator back to parameters end General;and the type General_Iterator and the corresponding Action procedure take the form
type General_Iterator is new Iterator with record ... -- components for parameters and workspace end record; procedure Action(E: in out Element; I: in out General_Iterator) is begin E := ...; -- do something to element using data from iterator end Action;
It is instructive to compare this example with the corresponding example using access discriminants in 3.7.1. Wherever possible similar identifiers have been used to make the analogy easier. The analogy could be made closer by putting the function Sets.Count of 3.7.1 inside a package as here.
Perhaps the most striking difference is that the two mechanisms are "inside out" to each other in some sense. A notable thing about the access discriminant approach is that the looping mechanism has to be written out for each action. Using type extension the loop is written out once and the dispatching call of Action reaches out to the specific routine required.
The type extension approach has a close similarity to the potential method using an access to subprogram value as a parameter. We would like to write something like
procedure Iterate(S: Set; Action: access procedure(E: in out Element)) is This: Ptr := Ptr(S); begin while This /= null loop Action(This.E); This := This.Next; end loop; end Iterate;and then
function Count(S: Set) return Natural is Result: Natural := 0; procedure Count_Action(E: in out Element) is begin Result := Result + 1; end Count_Action; begin Iterate(S, Count_Action'Access); return Result; end Count;but unfortunately we cannot have anonymous access to subprogram parameters as explained in 3.7.2. Declaring a named access type so that the above starts
type Action_Type is access procedure(E: in out Element); ... procedure Iterate(S: Set; Action: Action_Type) is ...does not work either because then the access to the internal procedure Count_Action is illegal. We have to make the procedure internal so that it can manipulate the variable Result. Note that we would not wish to make Result global because that would not work in multitasking programs. See the further discussion in 3.7.2 which also shows how the difficulties can be overcome with generics.
The reason for disallowing more general access to subprogram values is that they would require extra information regarding the environment of the procedure (in this case giving addressability of the variable Result). The call of the formal procedure and the dispatching call both serve similar purposes; they enable the iterate procedure to call out to the specific action procedure. In both cases extra information is required; the type extension method enables it to be passed in the type itself. The formal procedure method needs it within the underlying implementation and for a number of reasons this is considered too heavy a burden in the general case.
As mentioned earlier, there is a close analogy between the restrictions which ensure that a procedure value is (nearly) always a single address and those which ensure that a dispatching value is always a single address.
It is important to understand exactly when dispatching (dynamic binding) is used as opposed to the static resolution of binding familiar from Ada 83. The basic principle is that dispatching is used only when a controlling operand is of a class-wide type. In order to facilitate the discussion we will reconsider the New_Alert_System introduced in II.1. The call
Handle(A); -- A of type Alert'Classin the procedure Process_Alerts in II.2 is a dispatching call. The value of the tag of A is used to determine which procedure Handle to call and this is determined at run time.
On the other hand a call such as
Handle(Alert(MA));in the procedure Handle belonging to the type Medium_Alert is not a dispatching call because the type of the operand is the specific type Alert as a result of the explicit type conversion.
It is also possible to dispatch on the result of a function when the context of the call determines the tag. Such a result is called a controlling result.
It is an important principle that all controlling operands and results of a call must have the same tag. If they are statically determined then, of course, this is checked at compile time. If they are dynamically determined (for example, variables of a class-wide type) then again the actual values must all have the same tag and of course this check has to be made at run time; Constraint_Error is raised if the check fails. In order to avoid confusion a mixed situation whereby some tags are statically determined and some are dynamically determined is not allowed. Thus in the case of the sets example in the previous section, it is illegal to write
S: Bit_Set := ... T: Set'Class := ... ... S := Union(S, T); -- illegaleven though at run-time it might be the case that the tag of the value of T might be Bit_Set'Tag. But we could write
S := Union(S, Bit_Set(T));and the view conversion will check that T is in Bit_Set'Class (the tag of T does not have to be Bit_Set'Tag; it could be of any specific type that can be converted to Bit_Set).
A special case arises when the tag is indeterminate. Consider for example the statement
To := Empty;in the procedure Convert. The parameterless function Empty has a controlling result but there is no controlling operand to determine the tag. Consequently the tag is determined from the class-wide parameter To which is the destination of the assignment. Of course, the tag of To is dynamically determined and this value is used for dispatching on Empty. The statement
To := Union(To, Unit(Elem));similarly causes dispatching on both Union and Unit according to the tag of To.
Another rule designed to avoid complexity is that it is not legal for a subprogram to have controlling operands or result of different tagged types. Although it is legal to declare two tagged types in the same package, it is not legal to declare a subprogram that has operands or result of both types in that same package. This can, of course, be done outside the package but then the subprogram is not a primitive operation of the types and does not dispatch anyway.
The difficulty with allowing such mixed controlling operands is that it would not be clear how to achieve the various possible combinations of derived operations if both types were derived. If the effect of such mixed operands is required then one type can be replaced by the corresponding class-wide type. See [RM95 3.9.2].
The rules for type conversion (see 3.8) are also designed for clarity. Type conversion is always allowed towards the root of a tree of tagged types and so we can convert a Medium_Alert into an Alert as in the call
On the other hand we cannot convert a specific type away from the root (there might be missing components); we have to use an extension aggregate even if there are no extra components. So we can "extend" an Alert into a Low_Alert by
LA := (A with null record);where we have to write null record because there are no extra components.
We can however convert a value of a class-wide type to a specific type as in
MA: Medium_Alert := Medium_Alert(AC);where AC is of the type Alert'Class. In such a case there is a run-time check that the current value of the class-wide parameter AC has a tag that identifies a specific type for which the conversion is possible. Hence it must identify the type Medium_Alert or a type derived from it so that the conversion is not away from the root of the tree. In other words we check that the value of AC is actually in Medium_Alert'Class.
As mentioned in 3.8 some conversions are what is known as view conversions. This means that the underlying object is not changed but we merely get a different view of it.
Almost all conversions of tagged types are view conversions. For example the conversion in
Handle(Alert(MA));is a view conversion. The value passed on to the call of Handle (that with parameter of type Alert) is in fact the same value as held in MA but the components relating to the type Medium_Alert are no longer visible. And in fact the tag still relates to the underlying value and this might even be the tag for High_Alert because it could have been view converted all the way down the tree. Remember also that tagged types are passed by reference.
However, if we did an assignment as in
MA := Medium_Alert(HA);then the tag of MA would not be changed and would not reflect that of the value in HA. All that happens is that the values of the components appropriate to the type of MA are copied from the object HA. Other components are of course ignored.
Furthermore, if MA were not a locally declared variable but an out or in out parameter, then again the tag of MA would not be changed. Remember, however, that the tag of MA in this case need not itself be Medium_Alert'Tag since a formal parameter is simply giving a view of the actual parameter and the tag of that could be of any type derived from Medium_Alert. But we do know that both sides of the assignment have the components appropriate to Medium_Alert and so the assignment works.
Note moreover that conversions of tagged types are allowed as the target of an assignment; thus
AC: Alert'Class := ... ... Medium_Alert(AC) := MA;will check that the tag of AC corresponds to Medium_Alert or a type derived from it (or in other words checks that AC in Medium_Alert'Class is true) and then copies just those components corresponding to the Medium_Alert view from the right hand side to the left hand side.
It might help to summarize the golden rules
The fact that a view conversion does not change the tag is absolutely vital for the implementation of what is known as redispatching.
There are often situations where one would like "multiple dispatch" either within a class, or between two or more classes. Ingalls cites a number of canonical examples such as displaying various kinds of graphical objects on different kinds of displays, event types and handlers, and unification and pattern matching [Ingalls 86]; he suggests a solution for Smalltalk-80 that is more modular than a single dispatch on one parameter, followed by a case statement on the dynamic type of a second parameter. Multiple dispatch is possible in Ada 95 via class-wide types. We first consider the simple case of redispatching within the same class.
It often happens that after one dispatching operation we apply a further common (and inherited) operation and so need to dispatch once more to an operation of the original type. If the original tag were lost then this would not be possible.
Consider again (from II.1)
procedure Handle(MA: in out Medium_Alert) is begin Handle(Alert(MA)); -- handle as plain Alert MA.Action_Officer := Assign_Volunteer; Display(MA, Console); end Handle;in which there is a call of the procedure Display. This call is not a dispatching call because the parameter is of a specific type (and indeed there is only one procedure Display which is inherited by all the types).
As written it has been assumed that the display operation is the same for all alerts. However, suppose that in fact it was desired to express the message in different ways according to the level of the alert (in different colors perhaps or flashing).
It would be possible to do this by using the Tag attribute to look at the original value of the tag by writing
procedure Display(A: Alert; On: Device) is AC: Alert'Class renames Alert'Class(A); begin if AC'Tag = Low_Alert'Tag then -- display a low alert elsif AC'Tag = Medium_Alert'Tag then -- display a medium alert else -- display a high alert end if; end Display;
Note that we could have written
AC: Alert'Class := A;rather than the renaming but this would cause an unnecessary assignment. Note moreover that we cannot apply the Tag attribute to an object of a specific type; it would be rather surprising for A'Tag not to be Alert'Tag.
However, using tags in this way inside the body of Display is quite inappropriate since it has reintroduced the rigid nature of variant programming and could not specifically recognize an alert which is a later extension.
The proper approach is to use redispatching. If we need a different display mechanism for the different alert levels then we write distinct procedures for each one (thus overriding the procedure inherited from the root level) and then redispatch in the various procedures Handle as follows
procedure Handle(MA: in out Medium_Alert) is begin Handle(Alert(MA)); -- handle as plain Alert MA.Action_Officer := Assign_Volunteer; Display(Medium_Alert'Class(MA), Console); -- redispatch end Handle;
This will work properly and the message will be displayed according to the specific type of the original alert.
Another possibility is that the type Device might not be represented as a simple enumeration, but instead as a record type, with components representing various aspects of the device. A class of device types could be constructed using tagged types and type extension. Each kind of device must implement an Output operation that each kind of alert will use to implement its Display operation. In order to call the appropriate Output procedure two dispatching operations are involved. First, the type of the alert parameter controls the dispatch to the Display procedure, and then within that procedure a dispatch on the Device parameter will select the appropriate Output operation for the device being used as a display. This double dispatching can be accommodated by making Display a class-wide operation of the device class. The Display procedure for Alert then becomes
procedure Display(A: Alert; On: Device'Class) is begin ... Output(On); -- dispatch on On ... end Display;so that within each Display procedure, a call to Output, with parameter On will dispatch to the appropriate operation for the Device.
Note once more that it would not have been legal for the specification of Display to have been
procedure Display(A: Alert; On: Device);since a procedure cannot have controlling operands of more than one tagged type.
Some languages permit a derived type, or class, to have more than one parent. These languages are said to support "multiple inheritance". Multiple inheritance is a second-generation object oriented programming mechanism. It originated in MIT's FLAVORS extension to LISP; a precursor to the Common Lisp Object System.
Multiple inheritance poses awkward problems if approached naively, as pointed out by [Budd 91]. There are two conceptual difficulties; what to do if an operation with a given profile belongs to both parents - which, if any, is inherited and how could we distinguish them; and what to do if the same component belongs to both parents from a common ancestor - are there two copies or only one? There are also implementation difficulties associated with these conceptual difficulties.
However, most uses of multiple inheritance fall into one of three idioms each of which can be implemented in Ada 95 using facilities such as access discriminants, generic units and type composition in conjunction with the Ada 95 type extension as will be illustrated in the next few sections.
Given the need to balance the benefits of language defined multiple inheritance with the complexity of the revised language, the potential for distributed overhead caused by multiple inheritance, and the scope of the revision, we chose to support multiple inheritance with a building block approach rather than an extra language construct.
The first form of multiple inheritance is, to quote N. Guimaraes of AT&T, "to combine two classes, one that defines the protocol of the component, and another that provides an implementation" [Guimaraes 91]. In languages such as Eiffel and C++, where classes are the only form of module, inheritance is the most common mechanism for combining abstractions. For instance, an Eiffel class Bounded_Stack[T], could be constructed by inheriting from an abstract class Stack[T] and a second class Array[T]. Class Array[T] would then be used to implement the abstract operations not defined by class Stack[T]. The programmer must specify the implementation of each such operation, and ideally, the array operations should also be hidden from users of Bounded_Stack[T]. The effect of this idiom of multiple inheritance could be achieved in Ada 83 through type composition - inheritance is not required. In Ada, one may implement one type in terms of another, and hide that implementation as a private type.
package Bounded is type Bounded_Stack(Size: Natural := 0) is private; procedure Push(S: in out Bounded_Stack; Element: T); procedure Pop(S: in out Bounded_Stack); function Top(S: Bounded_Stack) return T; private type T_Array is array (Integer range <>) of T; type Bounded_Stack(Size: Natural := 0) is record Data: T_Array(1..Size); end record; end Bounded;
Using the idiom of section 4.4.3 where we discussed the set abstraction, we could derive from a tagged abstract type Stack, and implement bounded stacks as arrays. In either case, the operations on Bounded_Stack must be explicitly declared, whether being defined or overridden.
A second idiomatic use of multiple inheritance can be termed mixin inheritance. In mixin inheritance, one of the parent classes cannot have instances of its own and exists only to provide a set of properties for classes inheriting from it. Typically, this abstract, mixin class has been isolated solely for the purpose of combining with other classes. Ada 95 can provide mixin inheritance using tagged type extension (single inheritance) and generic units. The generic template defines the mixin. The type supplied as generic actual parameter determines the parent.
Thus we can write
generic type S is abstract tagged private; package P is type T is abstract new S with private; -- operations on T private type T is abstract new S with record -- additional components end record; end P;where the body provides the operations and the specification exports the extended type.
We can then use an instantiation of P to add the operations of T to any existing tagged type and the resulting type will of course still be in the class of the type passed as actual parameter. Note that in this idiom we have specified both the formal type and the exported type as abstract. This enables the supplied actual type to be abstract. We could declare a cascade of types in this manner thereby adding an unbounded sequence of properties to the original type. We would finally make one further extension in order to declare a type which was not abstract.
As a concrete example, the following generic package adds the property of having multiple versions to any tagged type.
with OM; -- Object Manager provides unique object IDs with VM; -- Version Manager provides version control generic type Parent is abstract tagged private; package Versioned is -- A versioned object has an ID, which identifies -- the set of versions of that object, plus a version -- number that, combined with the ID, identifies an -- object uniquely. type Versioned_Object is abstract new Parent with private; -- given an object, return a new version of that object procedure Create_New_Version(O : in Versioned_Object New_O: out Versioned_Object); -- given an object, returns its version number function Version_Number(O: Versioned_Object) return VM.Version_Number; -- given an object and a version number, return that -- version of the object procedure Get_Version( ID_From: in Versioned_Object; Version: in VM.Version_Number; Object : out Versioned_Object); private type Versioned_Object is abstract new Parent with record ID : OM.Object_ID := OM.Unique_ID; Version: VM.Version_Number := VM.Initial_Version; end record; end Versioned;
An important variation on this approach allows us to extend a type privately with generic operations that the client cannot see. This relies on the fact that the full type corresponding to a private extension need not be directly derived from the given ancestor. Thus the full type corresponding to
type Special_Object is new Ancestor with private;need not be directly derived from Ancestor; it could be indirectly derived from Ancestor. We can therefore write
private package Q is new P(Ancestor); type Special_Object is new Q.T with null record;and then the type Special_Object will also have all the components and properties of the type T in the generic package P. As written, these are, of course, not visible to the client but subprograms in the visible part of the package in which Special_Object is declared could be implemented in terms of them. Note also that the type Special_Object is not abstract even though the type Q.T is abstract.
As another example of mixin inheritance reconsider the second queue package in 4.4.1. We could make it generic thus
generic type Data(<>) is abstract tagged private; package Queues is type Queue is limited private; type Queue_Element is abstract new Data with private; type Element_Ptr is access all Queue_Element'Class; function Is_Empty(Q: Queue) return Boolean; procedure Add_To_Queue(Q: access Queue; E: in Element_Ptr); function Remove_From_Queue(Q: access Queue) return Element_Ptr; Queue_Error: exception; privateand then the modified base of the alert system could be
with Queues; package Base_Alert_System is type Root_Alert is abstract tagged null record; package Alert_Queues is new Queues(Root_Alert); subtype Alert_Queue is Alert_Queues.Queue; type Alert is abstract new Alert_Queues.Queue_Element with null record; procedure Handle(A in out Alert) is abstract; end Base_Alert_System;with the rest of the structure much as before. The major difference is that only alerts can be placed on an alert queue declared as
type Alert_Queue_Ptr is access all Alert_Queue; The_Queue: Alert_Queue_Ptr := new Alert_Queue; ...whereas previously all queues were quite general. With this formulation there is no risk of placing an alert on a queue of some other type such as animals. Thus although the queue is heterogeneous, nevertheless it is constrained to accept only objects of the appropriate class.
This example also illustrates the use of a series of abstract types. We start with Root_Alert which is abstract and exists in order to characterize the queues; add the queue element property and thus export Queue_Element which is itself abstract; we then derive the abstract Alert which forms the true base of the alert system and provides the ability to declare the dispatching operation Handle. Only then do we develop specific types for the alerts themselves.
Our final example shows how a window system could be constructed and illustrates the cascade of mixins mentioned above. We start with a basic window and various operations
type Basic_Window is tagged limited private; procedure Display(W: in Basic_Window); procedure Mouse_Click(W: in out Basic_Window; Where: in Mouse_Coords); ...and then we define a number of mixin generics of the familiar pattern such as
generic type Some_Window is abstract new Basic_Window with private; package Label_Mixin is type Window_With_Label is abstract new Some_Window with private; -- override some operations procedure Display(W: in Window_With_Label); -- add some new ones procedure Set_Label(W: in out Window_With_Label; S: in String); function Label(W: Window_With_Label) return String; private type Window_With_Label is abstract new Some_Window with record Label: String_Quark := Null_Quark; -- an X-Windows like unique ID for a string end record; end Label_Mixin;
Note that this is slightly different to our previous examples since it can only be applied to the type Basic_Window or a type derived from Basic_Window.
In the generic body we can implement the overriden and new operations, using any inherited operations as necessary. Thus the new version of Display applicable to a Window_With_Label might be
procedure Display(W: Window_With_Label) is begin Display(Some_Window(W)); -- display normally using operation of parent type if W.Label /= Null_Quark then -- now display the label if not null Display_On_Screen(XCoord(W), YCoord(W)-5, Value(W.Label)); end if; end Display;where the functions XCoord and YCoord are inherited from Basic_Window and give the coordinates for where to display the label.
We might declare a whole series of such packages and then finally write
package Frame is type My_Window is new Basic_Window with private; ...-- exported operations private package Add_Label is new Label_Mixin(Basic_Window); package Add_Border is new Border_Mixin(Add_Label.Window_With_Label); package Add_Menu_Bar is new Menu_Bar_Mixin(Add_Border.Window_With_Border); type My_Window is new Add_Menu_Bar.Window_With_Menu_Bar with null record; end Frame;
Observe that the final declaration has a null extension; it could add further components if required. The various operations exported from the individual mixins can be exported selectively from the package Frame by suitable renamings in the package body.
Finally, there are uses of multiple inheritance where the derived type or class is truly a derivative of more than one parent and clients of that type want to "view it" as any of its parents. This may be accomplished in Ada 95 using access discriminants which effectively enable us to parameterize one record with another.
An access discriminant can be used to enable a component of a record to obtain the identity of the record in which it is embedded (see 3.4.1). This enables complex chained structures to be created and can provide multiple views of a structure. Consider
type Outer is limited private; private type Inner(Ptr: access Outer) is limited ... type Outer is limited record ... Component: Inner(Outer'Access); ... end record;
The Component of type Inner has an access discriminant Ptr which refers back to the enclosing instance of the record Outer. This is because the attribute Access applied to the name of a record type inside its declaration refers to the current instance of the type. This is similar to the way in which the name of a task type refers to the current task inside its own body rather than to the type itself; see [RM83 9.1(4)]. If we now declare an object of the type Outer
Obj: Outer;then the self-referential structure created is as shown in Figure 4-3. Note that the structure becomes self-referential automatically. This is not the same as the effect that would be obtained with a record in which an instance might happen to have a component referring to itself as a consequence of an assignment. All instances of the type Outer will refer to themselves; Ptr cannot change because discriminants are constant.
This simple example on its own is of little interest. However, the types Inner and Outer can both be extensions of other types and these other types might themselves be chained structures. For example, the type Inner might be an extension of some type Node containing components which access other objects of the type Node in order to create a tree. Note in particular that Inner could also be
type Inner(Ptr: access Outer'Class) is new Node with ...so that heterogeneous chains can be constructed. (Outer has to be tagged in this case.) The important point is that we can navigate over the tree which consists of the components of type Inner linked together but at any point in the tree we can reach to the enclosing Outer record as a whole by the access discriminant Ptr.
It should be noted that an access discriminant is only allowed for a limited type. This avoids copying problems with the self-referring components and dangling references.
We now return to the window example of the previous section and show how access discriminants can be used to effectively mix together two hierarchies.
Suppose that as well as the hierarchy of windows which concern areas on the screen, we also have a hierarchy of monitors.
+--------------------------+ | | | | | | | | | +-------------+ | -+ +----> | | | | +- |-------------| | | | | Ptr |-----+ | | |-------------| | Component | | | | of type -| |.............| | Object Inner | | | |-- of type | |.............| | Outer | | | | +- |-------------| | | | | | | | | | | +-------------+ -+ Figure 4-3: A Self-Referential Structure
A monitor is a type which is designed to respond to change; it has a primitive operation Update which is called to perform the response. An object that wishes to be monitored keeps a linked list of monitors and calls their Update operation whenever necessary; the chain may contain many different monitors according to what might need to be updated. If we were doing a complex modelling application concerned with molecular structure then when we change the object we might wish to redraw some representation on the screen, make a record of the previous state, recompute the molecular weight and so on. The various monitors each contain a reference to the monitored object. The type monitored object itself contains a pointer to the start of the chain and is extended with additional information as needed by the application. Thus we have
type Monitor; type Monitor_Ptr is access all Monitor'Class; type Monitored_Object is abstract tagged limited record First: Monitor_Ptr; -- list of monitors -- more components to be added by extension -- according to the needs of the specific application end record; type Monitored_Object_Ptr is access all Monitored_Object'Class; type Monitor is abstract tagged limited record Next: Monitor_Ptr; Obj: Monitored_Object_Ptr; -- more components to be added by extension -- according to the needs of the specific monitor end record; procedure Update(M: in out Monitor) is abstract; ... procedure Notify(MO: Monitored_Object'Class) is This_Mon: Monitor_Ptr := MO.First; begin while This_Mon /= null loop Update(This_Mon.all); -- dispatch for each monitor This_Mon := This_Mon.Next; end loop; end Notify;where Notify is a class wide operation of the type Monitored_Object and calls all the Update operations of the monitors on the chain. If our object representing the molecule has type Molecule then we would write
type Monitored_Molecule is new Monitored_Object with record M: Molecule; end record; ... Proposed_Immortality_Drug: Monitored_Molecule;and then perform all our work on the monitored molecule and from time to time invoke the updates by calling
The configuration might be as in Figure 4-4.
+------------------+<-----------------+ | | | | | | | +----------+ | +----------+ | +----------+ +-->| First |---+-->| Next |---+-->| | |----------| | |----------| | |----------| | The | +---| Obj | +---| | | molecule | |----------| |----------| | | | Special | | | | | | data for | | | +----------+ | this | | | | monitor | | | +----------+ +----------+ The object Two monitors on the chain Figure 4-4: A Monitor Chain
Now suppose we want to use one of our windows as part of the updating process so that, for example, the picture of the molecule is displayed within a window rather than directly on the raw screen. In order to do this we need to hang the window display mechanism on the monitor chain so that an appropriate update causes the Display operation to be called. In other words we need to create a Window that can act as a Monitor as well as a Window. First we define a mixin that is a monitor and override its Update operation thus
type Monitor_Mixin(Win: access Basic_Window'Class) is new Monitor with null record; procedure Update(M: in out Monitor_Mixin);
The body for this might be
procedure Update(M: in out Monitor_Mixin) is -- simply redisplay the window begin Display(M.Win.all); -- this is a dispatching call end Update;and now we can mix this Monitor_Mixin into any window type by writing
type Window_That_Monitors is new My_Window with record Mon: Monitor_Mixin(Window_That_Monitors'Access); end record;where the inner component Mon has a discriminant that refers to the outer type. The monitor component of this can now be linked into the chain as shown in Figure 4-5. Calling Notify on the monitored molecule results in the various procedures Update being called. The Update for the type Monitor_Mixin calls the Display for the type Window_That_Monitors of which it is part and this has access to all the information about the window as well as the information about being a monitor.
+-------------------+ | | | +----------+ | +--->|These | | |are the | | |components| | |for | | |My_Window | | +------------------+ | | | | | |----------| | | | | Win |---+ | +----------+ | |----------| +-->| First |---+---->| Next |----------> |----------| | |----------| | The | +-----| Obj | | molecule | +----------+ | | | | +----------+ Figure 4-5: The Window-that-Monitors in the Chain
We could of course define a more sophisticated type Monitor_Mixin that did other things as well as simply calling the Display operation of the associated window.
The examples in this and the previous section show that Ada 95 provides support for the construction of effectively arbitrary multiple inheritance hierarchies. This has been achieved without having intrinsic multiple inheritance which could be a pervasive implementation burden on simple single inheritance applications.
Object oriented programming originated with Simula [Birtwistle 73]. Simula was designed to be an almost upward compatible extension of Algol 60, inspired by the application domain of simulation, although it is really a general purpose programming language. The key insights from simulation were that it is useful to think of a complex simulation as being organized around a collection of autonomous, interacting objects, and that the construction of such simulations could be facilitated by abstracting this notion of object into a language construct.
Simula introduced the notion of a class as an abstraction mechanism over objects. A class is a template for creating objects with a common data structure and operations on that data structure. These operations determine the possible behavior of the objects of the class. Operations may be sensitive to the current state of the object, and may update that state by changing the values of the data structure.
A Simula class definition specifies a data structure for the class, the operations on that data, and a body used to initialize objects of the class upon their creation, like the sequence of statements in a package body. The data definition and procedure declarations constitute the class's interface to programmers. The Simula class is somewhere between a data type and a module. Instances of the class may be declared, assigned to variables, and passed as parameters, like values of a typical data type.
Simula introduced a means to define new classes from old ones; a class could "inherit" from another class, deriving its structure and operations from that "parent". The new class could augment or override its inheritance, adding new data and new operations, or replacing one or more of its operations. Data could not be removed.
Smalltalk [Goldberg 83] was influenced by Simula's notion of class and subclassing. While Simula was a compiled language, Smalltalk was interpreted. It was originally intended as an interactive, systems programming language for Alan Kay's Dynabook project.
Smalltalk introduced the "message-passing" style of invoking operations. A message is a request to an object to invoke an operation. The set of messages that an object recognizes and is capable of responding to is called its "protocol" and is determined by the class of the object. When an object is sent a message, a search begins in the class of the object class for a method (operation definition) corresponding to the message. If not found, the search continues in the parent class (superclass), this continues upward in the class hierarchy until either an appropriate method is found or the root of the hierarchy is reached without success, in which case an error is signaled.
The historical fact that some early object oriented languages were interpreted has contributed to the impression that their mechanisms are necessarily too inefficient for real-time or production use. Many object oriented languages (including Simula) also use implicit reference semantics (in which all variables are really pointers), thereby raising the issue of run-time storage management. It was these efficiency considerations that apparently prevented Ada 83 from providing inheritance and polymorphism, given Ada's overriding concerns with run- time efficiency, and type safety [Brosgol 89]. More recently, there have been a number of languages developed that support object oriented programming in a relatively safe, compiled, and efficient style, including Trellis/Owl [Schaffert 86], Eiffel [Meyer 88], Modula-3 [Nelson 91] and C++ [Ellis 90].
The essence of the evolution of OOPLs has thus been to obtain an appropriate balance between compile-time and run-time identification of the operations to be performed. If the identification is at run-time then the operations are usually called methods; alternative terms are virtual functions (C++, Simula) and dispatching operations (the Ada 95 term).
In Smalltalk-80, for example, method invocations have the form
receiver Methodname Argstomethodwhere receiver is the name of the target object.
This syntax simplifies dispatch; the dispatch is determined solely by the class of the receiver of the message. Eiffel and C++ also use the "distinguished receiver" approach.
In languages where a function or procedure call syntax is permitted, and where more than one argument of the call may be of the class, the situation is more complex. Trellis/Owl [Schaffert 86]) follows the Smalltalk-80 tradition and arbitrarily designates the first parameter of the call as determining the dispatch. Some languages distinguish this parameter by its appearance as a prefix in the call.
Other possible schemes include
Ada 95 has adopted (1). This is a logical choice, given that the dispatching operations of a type are the primitive operations of that type and are derived from those of the root type with systematic replacement. So, in Ada 95, more than one operand, or even the result, may control the dispatch. For a primitive operation of a type T, the dispatching is controlled by the operands of type T, and the result if it is of type T.
There are a number of other important differences between Ada 95 and other languages; these differences are designed to add clarity (which encourages programmers to write the correct code) and safety (which prevents disaster if they do not).
The first difference is that in Ada 95, an operation is only dispatching when applied to an actual parameter of a class-wide type. In other OOPLs, a dispatch is possible whenever an object reference or pointer is used as the prefix to the operation. In Ada 95 terms, this means that references/pointers in such OOPLs are always treated as though they designate a class-wide type. Ada 95 allows a formal parameter or an access value to have a specific type as its "referent" (this is the default, preserving upward compatibility and safety). Ada 95 also allows an actual parameter or an access value to have a class-wide type as its referent, in which case dispatching is also possible.
A second difference is that, in Ada 95, if a type T is tagged, then all of its primitive operations are dispatching operations; when passed a class-wide operand, they dispatch. In C++, only those particular member functions identified as virtual involve a run-time dispatch. In Ada 95, a (non-dispatching) class-wide operation may be defined by explicitly declaring it with a formal parameter of type T'Class. No dispatch is performed in this case, because the body of a class-wide operation expects its actual parameter to still be class-wide. Note that, as in C++, a run-time dispatch may ultimately occur, when such an operation calls a dispatching operation somewhere within its body. This is illustrated by the procedure Process_Alerts in II.2.
A final and important difference between Ada 95 and some other OOPLs is that dispatching is safe in the sense that a call to a dispatching operation always has a well-defined implementation to dispatch to. In some OOPLs, such as Smalltalk, it is possible to send a message to an object that has no method for handling that message; a run-time error results. In Ada, such errors are always detected at compile time.
When a primitive operation is called with class-wide operands in all controlling positions, a run-time check is made that all of these controlling operands have the same tag value, and the result is defined to return this same tag value. This common tag value is called the controlling tag value for the call, and identifies the specific type whose corresponding primitive operation is used to implement this call.
This requirement that all controlling operands have the same tag value reflects an existing Ada 83 rule for derived types. The type of all operands of a parent type are systematically replaced with the derived type when inheriting a primitive operation. A primitive operation can only be a primitive operation of one tagged type. It is possible but unusual for a primitive operation to also operate on another type within the same class (but it would not be primitive for that other type). Typically, each primitive operation operates only on one type within the class, and may return this same type.
By treating all controlling operands symmetrically, we avoid some of the difficulties and anomalies encountered in other OOPLs with binary operations. For example, taking the intersection of two sets is viewed as a symmetric operation as opposed to thinking of one set as being special (the "receiver"), with the other set being a mere argument.
By allowing the result context to control the dispatch, we allow parameterless functions to be used to represent type-specific literals, like an empty set in a tagged set class. See the discussion on the procedure Convert in 4.5.
There is no need to use run-time dispatch when a controlling operand or result has a statically known specific type. (A mixture of static and dynamically determined tags is not allowed.) In this case, the specific type's implementation of the primitive operation is then called directly (this is effectively a case of "static" binding).
As discussed in 4.3, the canonical implementation model for a type tag is a pointer to a run-time type descriptor, containing pointers to subprogram bodies implementing each of the primitive operations. This implementation model means that the call on a dispatching operation involves only tag-equality checks (if there is more than one controlling operand), and then a call through the appropriate subprogram pointer. The overhead for such a call is bounded, and can be kept to two or three instructions in most cases, ensuring that dispatching operations can be used even in demanding real-time applications. Note that this overhead is typically less than the overhead of using case statements and variant records.
For a tagged type T, even the implicitly provided operations (such as Object'Size and assignment if nonlimited) use dispatching internally when applied to a class-wide operand, to allow for new components that might be added by type extension.
Generally, for each primitive operation of a parent type, a type extension may either inherit the original implementation, or it may override it. For an operation that had an operand of the parent type, if not overridden it becomes an operation with an operand of the type extension, which simply ignores (and does not affect) the extension part of the operand. However, for an operation that returned a result of the parent type, if not overridden, it becomes an abstract operation that has no implementation for the extension. This is because the extension part of the result would not be defined for such an operation.
Abstract operations allow a type to have a specification for an operation but no implementation for it, effectively requiring that each derivative define its own. Such operations have no default implementation, preventing a derivative from mistakenly inheriting a meaningless implementation. Abstract operations correspond to deferred methods or virtual methods in Smalltalk and C++. The corresponding class is called an abstract superclass.
If a tagged type has an abstract primitive operation, then it must be declared as an abstract type, and no objects with a tag identifying that type may be created. This means that a call to an abstract operation will always dispatch to some non-abstract implementation that is defined for some derivative. No run-time check is needed to detect whether an operation is abstract, because no objects with the tag for an abstract type can ever be created.
To conclude, the model of type extension and polymorphism in Ada 95 combines efficiency of implementation, clarity of program text and security in a cohesive manner. It provides the additional flexibility sought in an object oriented language without compromising the security which was the cornerstone of Ada 83.
The three major study topics
S4.1-A(1) - Subprograms as Objects S4.3-A(1) - Reducing the Need for Recompilation S4.3-B(1) - Programming by Specialization/Extensionare directly addressed and satisfied by the facilities discussed in this chapter.