source: doc/generic_types/generic_types.tex @ 95448f1e

aaron-thesisarm-ehcleanup-dtorsdeferred_resndemanglerjacob/cs343-translationjenkins-sandboxnew-astnew-ast-unique-exprnew-envno_listpersistent-indexerresolv-newwith_gc
Last change on this file since 95448f1e was 95448f1e, checked in by Aaron Moss <a3moss@…>, 5 years ago

Added acknowledgements, spacing tweaks

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1% take off review (for line numbers) and anonymous (for anonymization) on submission
2% \documentclass[format=acmlarge, anonymous, review]{acmart}
3\documentclass[format=acmlarge, review]{acmart}
4
5\usepackage{listings}   % For code listings
6
7% Useful macros
8\newcommand{\CFA}{C$\mathbf\forall$} % Cforall symbolic name
9\newcommand{\CC}{\rm C\kern-.1em\hbox{+\kern-.25em+}} % C++ symbolic name
10\newcommand{\CCeleven}{\rm C\kern-.1em\hbox{+\kern-.25em+}11} % C++11 symbolic name
11\newcommand{\CCfourteen}{\rm C\kern-.1em\hbox{+\kern-.25em+}14} % C++14 symbolic name
12\newcommand{\CCseventeen}{\rm C\kern-.1em\hbox{+\kern-.25em+}17} % C++17 symbolic name
13\newcommand{\CCtwenty}{\rm C\kern-.1em\hbox{+\kern-.25em+}20} % C++20 symbolic name
14
15\newcommand{\TODO}{\textbf{TODO}}
16\newcommand{\eg}{\textit{e}.\textit{g}.}
17\newcommand{\ie}{\textit{i}.\textit{e}.}
18\newcommand{\etc}{\textit{etc}.}
19
20% CFA programming language, based on ANSI C (with some gcc additions)
21\lstdefinelanguage{CFA}[ANSI]{C}{
22        morekeywords={_Alignas,_Alignof,__alignof,__alignof__,asm,__asm,__asm__,_At,_Atomic,__attribute,__attribute__,auto,
23                _Bool,bool,catch,catchResume,choose,_Complex,__complex,__complex__,__const,__const__,disable,dtype,enable,__extension__,
24                fallthrough,fallthru,finally,forall,ftype,_Generic,_Imaginary,inline,__label__,lvalue,_Noreturn,one_t,otype,restrict,size_t,sized,_Static_assert,
25                _Thread_local,throw,throwResume,trait,try,ttype,typeof,__typeof,__typeof__,zero_t},
26}%
27
28\lstset{
29language=CFA,
30columns=fullflexible,
31basicstyle=\linespread{0.9}\sf,                                                 % reduce line spacing and use sanserif font
32stringstyle=\tt,                                                                                % use typewriter font
33tabsize=4,                                                                                              % 4 space tabbing
34xleftmargin=\parindent,                                                                 % indent code to paragraph indentation
35% extendedchars=true,                                                                   % allow ASCII characters in the range 128-255
36% escapechar=§,                                                                                 % LaTeX escape in CFA code §...§ (section symbol), emacs: C-q M-'
37mathescape=true,                                                                                % LaTeX math escape in CFA code $...$
38keepspaces=true,                                                                                %
39showstringspaces=false,                                                                 % do not show spaces with cup
40showlines=true,                                                                                 % show blank lines at end of code
41aboveskip=4pt,                                                                                  % spacing above/below code block
42belowskip=3pt,
43% replace/adjust listing characters that look bad in sanserif
44literate={-}{\raisebox{-0.15ex}{\texttt{-}}}1 {^}{\raisebox{0.6ex}{$\scriptscriptstyle\land\,$}}1
45        {~}{\raisebox{0.3ex}{$\scriptstyle\sim\,$}}1 {_}{\makebox[1.2ex][c]{\rule{1ex}{0.1ex}}}1 {`}{\ttfamily\upshape\hspace*{-0.1ex}`}1
46        {<-}{$\leftarrow$}2 {=>}{$\Rightarrow$}2 {->}{$\rightarrow$}2,
47% moredelim=**[is][\color{red}]{®}{®},                                  % red highlighting ®...® (registered trademark symbol) emacs: C-q M-.
48% moredelim=**[is][\color{blue}]{ß}{ß},                                 % blue highlighting ß...ß (sharp s symbol) emacs: C-q M-_
49% moredelim=**[is][\color{OliveGreen}]{¢}{¢},                   % green highlighting ¢...¢ (cent symbol) emacs: C-q M-"
50% moredelim=[is][\lstset{keywords={}}]{¶}{¶},                   % keyword escape ¶...¶ (pilcrow symbol) emacs: C-q M-^
51}% lstset
52
53% inline code @...@
54\lstMakeShortInline@
55
56% ACM Information
57\citestyle{acmauthoryear}
58
59\acmJournal{PACMPL}
60
61\title{Generic and Tuple Types with Efficient Dynamic Layout in \CFA{}}
62
63\author{Aaron Moss}
64\affiliation{%
65        \institution{University of Waterloo}
66        \department{David R. Cheriton School of Computer Science}
67        \streetaddress{Davis Centre, University of Waterloo}
68        \city{Waterloo}
69        \state{ON}
70        \postcode{N2L 3G1}
71        \country{Canada}
72}
73\email{a3moss@uwaterloo.ca}
74
75\author{Robert Schluntz}
76\affiliation{%
77        \institution{University of Waterloo}
78        \department{David R. Cheriton School of Computer Science}
79        \streetaddress{Davis Centre, University of Waterloo}
80        \city{Waterloo}
81        \state{ON}
82        \postcode{N2L 3G1}
83        \country{Canada}
84}
85\email{rschlunt@uwaterloo.ca}
86
87\author{Peter Buhr}
88\affiliation{%
89        \institution{University of Waterloo}
90        \department{David R. Cheriton School of Computer Science}
91        \streetaddress{Davis Centre, University of Waterloo}
92        \city{Waterloo}
93        \state{ON}
94        \postcode{N2L 3G1}
95        \country{Canada}
96}
97\email{pabuhr@uwaterloo.ca}
98
99\terms{generic, tuple, types}
100\keywords{generic types, tuple types, polymorphic functions, C, Cforall}
101
102\begin{CCSXML}
103<ccs2012>
104<concept>
105<concept_id>10011007.10011006.10011008.10011024.10011025</concept_id>
106<concept_desc>Software and its engineering~Polymorphism</concept_desc>
107<concept_significance>500</concept_significance>
108</concept>
109<concept>
110<concept_id>10011007.10011006.10011008.10011024.10011028</concept_id>
111<concept_desc>Software and its engineering~Data types and structures</concept_desc>
112<concept_significance>500</concept_significance>
113</concept>
114<concept>
115<concept_id>10011007.10011006.10011041.10011047</concept_id>
116<concept_desc>Software and its engineering~Source code generation</concept_desc>
117<concept_significance>300</concept_significance>
118</concept>
119</ccs2012>
120\end{CCSXML}
121
122\ccsdesc[500]{Software and its engineering~Polymorphism}
123\ccsdesc[500]{Software and its engineering~Data types and structures}
124\ccsdesc[300]{Software and its engineering~Source code generation}
125
126\begin{abstract}
127The C programming language is a foundational technology for modern computing, with millions of lines of code implementing everything from commercial operating systems to hobby projects. This installed base of code and the programmers who produced it represent a massive software engineering investment spanning decades. Nonetheless, C, first standardized over thirty years ago, lacks many features that make programming in more modern languages safer and more productive. The goal of the \CFA{} project is to create an extension of C that provides modern safety and productivity features while still ensuring strong backwards compatibility with C. Particularly, \CFA{} is designed to have an orthogonal feature set based closely on the C programming paradigm, so that \CFA{} features can be added incrementally to existing C code-bases, and C programmers can learn \CFA{} extensions on an as-needed basis, preserving investment in existing engineers and code. This paper describes how generic and tuple types are implemented in \CFA{} in accordance with these principles.
128\end{abstract}
129
130\begin{document}
131
132\maketitle
133
134\section{Introduction \& Background}
135
136\CFA{}\footnote{Pronounced ``C-for-all'', and written \CFA{} or Cforall.} is an evolutionary extension of the C programming language that aims to add modern language features to C while maintaining both source compatibility with C and a familiar mental model for programmers. Four key design goals were set out in the original design of \CFA{} \citep{Bilson03}:
137\begin{enumerate}
138\item The behaviour of standard C code must remain the same when translated by a \CFA{} compiler as when translated by a C compiler.
139\item Standard C code must be as fast and as small when translated by a \CFA{} compiler as when translated by a C compiler.
140\item \CFA{} code must be at least as portable as standard C code.
141\item Extensions introduced by \CFA{} must be translated in the most efficient way possible.
142\end{enumerate}
143The purpose of these goals is to ensure that existing C code-bases can be converted to \CFA{} incrementally and with minimal effort, and that programmers who already know C can productively produce \CFA{} code without training in \CFA{} beyond the extension features they wish to employ. In its current implementation, \CFA{} is compiled by translating it to GCC-dialect C, allowing it to leverage the portability and code optimizations provided by GCC, meeting goals (1)-(3).
144
145\CFA{} has been previously extended with polymorphic functions and name overloading (including operator overloading) \citep{Bilson03}, and deterministically-executed constructors and destructors \citep{Schluntz17}. This paper describes how generic and tuple types are designed and implemented in \CFA{} in accordance with both the backward compatibility goals and existing features described above.
146
147\subsection{Polymorphic Functions}
148\label{sec:poly-fns}
149
150\CFA{}'s polymorphism was originally formalized by \citet{Ditchfield92}, and first implemented by \citet{Bilson03}. The signature feature of \CFA{} is parametric-polymorphic functions; such functions are written using a @forall@ clause (which gives the language its name):
151\begin{lstlisting}
152forall(otype T)
153T identity(T x) { return x; }
154
155int forty_two = identity(42); // T is bound to int, forty_two == 42
156\end{lstlisting}
157The @identity@ function above can be applied to any complete object type (or ``@otype@''). The type variable @T@ is transformed into a set of additional implicit parameters to @identity@, that encode sufficient information about @T@ to create and return a variable of that type. The \CFA{} implementation passes the size and alignment of the type represented by an @otype@ parameter, as well as an assignment operator, constructor, copy constructor and destructor. If this extra information is not needed, the type parameter can be declared as @dtype T@, where @dtype@ is short for ``data type''.
158
159Here, the runtime cost of polymorphism is spread over each polymorphic call, due to passing more arguments to polymorphic functions; preliminary experiments have shown this overhead to be similar to \CC{} virtual function calls. An advantage of this design is that, unlike \CC{} template functions, \CFA{} @forall@ functions are compatible with separate compilation.
160
161Since bare polymorphic types do not provide a great range of available operations, \CFA{} provides a \emph{type assertion} mechanism to provide further information about a type:
162\begin{lstlisting}
163forall(otype T | { T twice(T); })
164T four_times(T x) { return twice( twice(x) ); }
165
166double twice(double d) { return d * 2.0; } // (1)
167
168double magic = four_times(10.5); // T is bound to double, uses (1) to satisfy type assertion
169\end{lstlisting}
170These type assertions may be either variable or function declarations that depend on a polymorphic type variable. @four_times@ can only be called with an argument for which there exists a function named @twice@ that can take that argument and return another value of the same type; a pointer to the appropriate @twice@ function is passed as an additional implicit parameter to the call of @four_times@.
171
172Monomorphic specializations of polymorphic functions can themselves be used to satisfy type assertions. For instance, @twice@ could have been defined using the \CFA{} syntax for operator overloading as:
173\begin{lstlisting}
174forall(otype S | { S ?+?(S, S); })
175S twice(S x) { return x + x; }  // (2)
176\end{lstlisting} 
177This version of @twice@ works for any type @S@ that has an addition operator defined for it, and it could have been used to satisfy the type assertion on @four_times@.
178The translator accomplishes this polymorphism by creating a wrapper function calling @twice // (2)@ with @S@ bound to @double@, then providing this wrapper function to @four_times@\footnote{\lstinline@twice // (2)@ could also have had a type parameter named \lstinline@T@; \CFA{} specifies renaming of the type parameters, which would avoid the name conflict with the type variable \lstinline@T@ of \lstinline@four_times@.}.
179
180\subsection{Traits}
181
182\CFA{} provides \emph{traits} as a means to name a group of type assertions, as in the example below:
183\begin{lstlisting}
184trait has_magnitude(otype T) {
185    bool ?<?(T, T);  // comparison operator for T
186    T -?(T);  // negation operator for T
187    void ?{}(T*, zero_t);  // constructor from 0 literal
188};
189
190forall(otype M | has_magnitude(M))
191M abs( M m ) {
192    M zero = { 0 };  // uses zero_t constructor from trait
193    return m < zero ? -m : m;
194}
195
196forall(otype M | has_magnitude(M))
197M max_magnitude( M a, M b ) {
198    return abs(a) < abs(b) ? b : a;
199}
200\end{lstlisting}
201This capability allows specifying the same set of assertions in multiple locations, without the repetition and likelihood of mistakes that come with manually writing them out for each function declaration.
202
203@otype@ is essentially syntactic sugar for the following trait:
204\begin{lstlisting}
205trait otype(dtype T | sized(T)) {
206        // sized is a compiler-provided pseudo-trait for types with known size & alignment
207        void ?{}(T*);  // default constructor
208        void ?{}(T*, T);  // copy constructor
209        void ?=?(T*, T);  // assignment operator
210        void ^?{}(T*);  // destructor
211};
212\end{lstlisting}
213Given the information provided for an @otype@, variables of polymorphic type can be treated as if they were a complete struct type -- they can be stack-allocated using the @alloca@ compiler builtin, default or copy-initialized, assigned, and deleted. As an example, the @abs@ function above produces generated code something like the following (simplified for clarity and brevity):
214\begin{lstlisting}
215void abs( size_t _sizeof_M, size_t _alignof_M,
216                void (*_ctor_M)(void*), void (*_copy_M)(void*, void*),
217                void (*_assign_M)(void*, void*), void (*_dtor_M)(void*),
218                bool (*_lt_M)(void*, void*), void (*_neg_M)(void*, void*),
219        void (*_ctor_M_zero)(void*, int),
220                void* m, void* _rtn ) {  // polymorphic parameter and return passed as void*
221        // M zero = { 0 };
222        void* zero = alloca(_sizeof_M);  // stack allocate zero temporary
223        _ctor_M_zero(zero, 0);  // initialize using zero_t constructor
224        // return m < zero ? -m : m;
225        void *_tmp = alloca(_sizeof_M)
226        _copy_M( _rtn,  // copy-initialize return value
227                _lt_M( m, zero ) ?  // check condition
228                 (_neg_M(m, _tmp), _tmp) :  // negate m
229                 m);
230        _dtor_M(_tmp); _dtor_M(zero);  // destroy temporaries
231}
232\end{lstlisting}
233
234Semantically, traits are simply a named lists of type assertions, but they may be used for many of the same purposes that interfaces in Java or abstract base classes in \CC{} are used for. Unlike Java interfaces or \CC{} base classes, \CFA{} types do not explicitly state any inheritance relationship to traits they satisfy; this can be considered a form of structural inheritance, similar to implementation of an interface in Go, as opposed to the nominal inheritance model of Java and \CC{}. Nominal inheritance can be simulated with traits using marker variables or functions:
235\begin{lstlisting}
236trait nominal(otype T) {
237    T is_nominal;
238};
239
240int is_nominal;  // int now satisfies the nominal trait
241\end{lstlisting}
242
243Traits, however, are significantly more powerful than nominal-inheritance interfaces; most notably, traits may be used to declare a relationship among multiple types, a property that may be difficult or impossible to represent in nominal-inheritance type systems:
244\begin{lstlisting}
245trait pointer_like(otype Ptr, otype El) {
246    lvalue El *?(Ptr); // Ptr can be dereferenced into a modifiable value of type El
247}
248
249struct list {
250    int value;
251    list *next;  // may omit "struct" on type names
252};
253
254typedef list *list_iterator;
255
256lvalue int *?( list_iterator it ) { return it->value; }
257\end{lstlisting}
258
259In the example above, @(list_iterator, int)@ satisfies @pointer_like@ by the user-defined dereference function, and @(list_iterator, list)@ also satisfies @pointer_like@ by the built-in dereference operator for pointers. Given a declaration @list_iterator it@, @*it@ can be either an @int@ or a @list@, with the meaning disambiguated by context (\eg{} @int x = *it;@ interprets @*it@ as an @int@, while @(*it).value = 42;@ interprets @*it@ as a @list@).
260While a nominal-inheritance system with associated types could model one of those two relationships by making @El@ an associated type of @Ptr@ in the @pointer_like@ implementation, few such systems could model both relationships simultaneously.
261
262\section{Generic Types}
263
264One of the known shortcomings of standard C is that it does not provide reusable type-safe abstractions for generic data structures and algorithms. Broadly speaking, there are three approaches to create data structures in C. One approach is to write bespoke data structures for each context in which they are needed. While this approach is flexible and supports integration with the C type-checker and tooling, it is also tedious and error-prone, especially for more complex data structures. A second approach is to use @void*@-based polymorphism. This approach is taken by the C standard library functions @qsort@ and @bsearch@, and does allow the use of common code for common functionality. However, basing all polymorphism on @void*@ eliminates the type-checker's ability to ensure that argument types are properly matched, often requires a number of extra function parameters, and also adds pointer indirection and dynamic allocation to algorithms and data structures that would not otherwise require them. A third approach to generic code is to use pre-processor macros to generate it -- this approach does allow the generated code to be both generic and type-checked, though any errors produced may be difficult to interpret. Furthermore, writing and invoking C code as preprocessor macros is unnatural and somewhat inflexible.
265
266Other C-like languages such as \CC{} and Java use \emph{generic types} to produce type-safe abstract data types. The authors have chosen to implement generic types as well, with some care taken that the generic types design for \CFA{} integrates efficiently and naturally with the existing polymorphic functions in \CFA{} while retaining backwards compatibility with C; maintaining separate compilation is a particularly important constraint on the design. However, where the concrete parameters of the generic type are known, there is not extra overhead for the use of a generic type.
267
268A generic type can be declared by placing a @forall@ specifier on a @struct@ or @union@ declaration, and instantiated using a parenthesized list of types after the type name:
269\begin{lstlisting}
270forall(otype R, otype S) struct pair {
271    R first;
272    S second;
273};
274
275forall(otype T)
276T value( pair(const char*, T) p ) { return p.second; }
277
278forall(dtype F, otype T)
279T value_p( pair(F*, T*) p ) { return *p.second; }
280
281pair(const char*, int) p = { "magic", 42 };
282int magic = value( p );
283
284pair(void*, int*) q = { 0, &p.second };
285magic = value_p( q );
286double d = 1.0;
287pair(double*, double*) r = { &d, &d };
288d = value_p( r );
289\end{lstlisting}
290
291\CFA{} classifies generic types as either \emph{concrete} or \emph{dynamic}. Dynamic generic types vary in their in-memory layout depending on their type parameters, while concrete generic types have a fixed memory layout regardless of type parameters. A type may have polymorphic parameters but still be concrete; in \CFA{} such types are called \emph{dtype-static}. Polymorphic pointers are an example of dtype-static types -- @forall(dtype T) T*@ is a polymorphic type, but for any @T@ chosen, @T*@ has exactly the same in-memory representation as a @void*@, and can therefore be represented by a @void*@ in code generation.
292
293\CFA{} generic types may also specify constraints on their argument type to be checked by the compiler. For example, consider the following declaration of a sorted set type, which ensures that the set key supports comparison and tests for equality:
294\begin{lstlisting}
295forall(otype Key | { bool ?==?(Key, Key); bool ?<?(Key, Key); })
296struct sorted_set;
297\end{lstlisting}
298
299\subsection{Concrete Generic Types}
300
301The \CFA{} translator instantiates concrete generic types by template-expanding them to fresh struct types; concrete generic types can therefore be used with zero runtime overhead. To enable inter-operation among equivalent instantiations of a generic type, the translator saves the set of instantiations currently in scope and reuses the generated struct declarations where appropriate. For example, a function declaration that accepts or returns a concrete generic type produces a declaration for the instantiated struct in the same scope, which all callers that can see that declaration may reuse. As an example of the expansion, the concrete instantiation for @pair(const char*, int)@ looks like this:
302\begin{lstlisting}
303struct _pair_conc1 {
304        const char* first;
305        int second;
306};
307\end{lstlisting}
308
309A concrete generic type with dtype-static parameters is also expanded to a struct type, but this struct type is used for all matching instantiations. In the example above, the @pair(F*, T*)@ parameter to @value_p@ is such a type; its expansion looks something like this, and is used as the type of the variables @q@ and @r@ as well, with casts for member access where appropriate:
310\begin{lstlisting}
311struct _pair_conc0 {
312        void* first;
313        void* second;
314};
315\end{lstlisting}
316
317\subsection{Dynamic Generic Types}
318
319Though \CFA{} implements concrete generic types efficiently, it also has a fully general system for computing with dynamic generic types. As mentioned in Section~\ref{sec:poly-fns}, @otype@ function parameters (in fact all @sized@ polymorphic parameters) come with implicit size and alignment parameters provided by the caller. Dynamic generic structs have the same size and alignment parameter, and also an \emph{offset array} which contains the offsets of each member of the struct\footnote{Dynamic generic unions need no such offset array, as all members are at offset 0; the size and alignment parameters are still provided for dynamic unions, however.}. Access to members\footnote{The \lstinline@offsetof@ macro is implemented similarly.} of a dynamic generic struct is provided by adding the corresponding member of the offset array to the struct pointer at runtime, essentially moving a compile-time offset calculation to runtime where necessary.
320
321These offset arrays are statically generated where possible. If a dynamic generic type is declared to be passed or returned by value from a polymorphic function, the translator can safely assume that the generic type is complete (that is, has a known layout) at any call-site, and the offset array is passed from the caller; if the generic type is concrete at the call site the elements of this offset array can even be statically generated using the C @offsetof@ macro. As an example, @p.second@ in the @value@ function above is implemented as @*(p + _offsetof_pair[1])@, where @p@ is a @void*@, and @_offsetof_pair@ is the offset array passed in to @value@ for @pair(const char*, T)@. The offset array @_offsetof_pair@ is generated at the call site as @size_t _offsetof_pair[] = { offsetof(_pair_conc1, first), offsetof(_pair_conc1, second) };@.
322
323In some cases the offset arrays cannot be statically generated. For instance, modularity is generally provided in C by including an opaque forward-declaration of a struct and associated accessor and mutator routines in a header file, with the actual implementations in a separately-compiled \texttt{.c} file. \CFA{} supports this pattern for generic types, and in this instance the caller does not know the actual layout or size of the dynamic generic type, and only holds it by pointer. The \CFA{} translator automatically generates \emph{layout functions} for cases where the size, alignment, and offset array of a generic struct cannot be passed in to a function from that function's caller. These layout functions take as arguments pointers to size and alignment variables and a caller-allocated array of member offsets, as well as the size and alignment of all @sized@ parameters to the generic struct (un-@sized@ parameters are forbidden from the language from being used in a context that affects layout). Results of these layout functions are cached so that they are only computed once per type per function.%, as in the example below for @pair@.
324% \begin{lstlisting}
325% static inline void _layoutof_pair(size_t* _szeof_pair, size_t* _alignof_pair, size_t* _offsetof_pair,
326%               size_t _szeof_R, size_t _alignof_R, size_t _szeof_S, size_t _alignof_S) {
327%     *_szeof_pair = 0; // default values
328%     *_alignof_pair = 1;
329
330%       // add offset, size, and alignment of first field
331%     _offsetof_pair[0] = *_szeof_pair;
332%     *_szeof_pair += _szeof_R;
333%     if ( *_alignof_pair < _alignof_R ) *_alignof_pair = _alignof_R;
334       
335%       // padding, offset, size, and alignment of second field
336%     if ( *_szeof_pair & (_alignof_S - 1) )
337%               *_szeof_pair += (_alignof_S - ( *_szeof_pair & (_alignof_S - 1) ) );
338%     _offsetof_pair[1] = *_szeof_pair;
339%     *_szeof_pair += _szeof_S;
340%     if ( *_alignof_pair < _alignof_S ) *_alignof_pair = _alignof_S;
341
342%       // pad to struct alignment
343%     if ( *_szeof_pair & (*_alignof_pair - 1) )
344%               *_szeof_pair += ( *_alignof_pair - ( *_szeof_pair & (*_alignof_pair - 1) ) );
345% }
346% \end{lstlisting}
347
348Layout functions also allow generic types to be used in a function definition without reflecting them in the function signature. For instance, a function that strips duplicate values from an unsorted @vector(T)@ would likely have a pointer to the vector as its only explicit parameter, but use some sort of @set(T)@ internally to test for duplicate values. This function could acquire the layout for @set(T)@ by calling its layout function with the layout of @T@ implicitly passed into the function.
349
350Whether a type is concrete, dtype-static, or dynamic is decided based solely on the type parameters and @forall@ clause on the struct declaration. This design allows opaque forward declarations of generic types like @forall(otype T) struct Box;@ -- like in C, all uses of @Box(T)@ can be in a separately compiled translation unit, and callers from other translation units know the proper calling conventions to use. If the definition of a struct type was included in the decision of whether a generic type is dynamic or concrete, some further types may be recognized as dtype-static (\eg{} @forall(otype T) struct unique_ptr { T* p };@ does not depend on @T@ for its layout, but the existence of an @otype@ parameter means that it \emph{could}.), but preserving separate compilation (and the associated C compatibility) in the existing design is judged to be an appropriate trade-off.
351
352\subsection{Applications}
353\label{sec:generic-apps}
354
355The reuse of dtype-static struct instantiations enables some useful programming patterns at zero runtime cost. The most important such pattern is using @forall(dtype T) T*@ as a type-checked replacement for @void*@, as in this example, which takes a @qsort@ or @bsearch@-compatible comparison routine and creates a similar lexicographic comparison for pairs of pointers:
356\begin{lstlisting}
357forall(dtype T)
358int lexcmp( pair(T*, T*)* a, pair(T*, T*)* b, int (*cmp)(T*, T*) ) {
359        int c = cmp(a->first, b->first);
360        if ( c == 0 ) c = cmp(a->second, b->second);
361        return c;
362}
363\end{lstlisting}
364Since @pair(T*, T*)@ is a concrete type, there are no added implicit parameters to @lexcmp@, so the code generated by \CFA{} is effectively identical to a version of this function written in standard C using @void*@, yet the \CFA{} version is type-checked to ensure that the fields of both pairs and the arguments to the comparison function match in type.
365
366Another useful pattern enabled by reused dtype-static type instantiations is zero-cost ``tag'' structs. Sometimes a particular bit of information is only useful for type-checking, and can be omitted at runtime. Tag structs can be used to provide this information to the compiler without further runtime overhead, as in the following example:
367\begin{lstlisting}
368forall(dtype Unit) struct scalar { unsigned long value; };
369
370struct metres {};
371struct litres {};
372
373forall(dtype U)
374scalar(U) ?+?(scalar(U) a, scalar(U) b) {
375        return (scalar(U)){ a.value + b.value };
376}
377
378scalar(metres) half_marathon = { 21093 };
379scalar(litres) swimming_pool = { 2500000 };
380
381scalar(metres) marathon = half_marathon + half_marathon;
382scalar(litres) two_pools = swimming_pool + swimming_pool;
383marathon + swimming_pool; // ERROR -- caught by compiler
384\end{lstlisting}
385@scalar@ is a dtype-static type, so all uses of it use a single struct definition, containing only a single @unsigned long@, and can share the same implementations of common routines like @?+?@ -- these implementations may even be separately compiled, unlike \CC{} template functions. However, the \CFA{} type-checker ensures that matching types are used by all calls to @?+?@, preventing nonsensical computations like adding the length of a marathon to the volume of an olympic pool.
386
387\section{Tuples}
388\label{sec:tuples}
389
390The @pair(R, S)@ generic type used as an example in the previous section can be considered a special case of a more general \emph{tuple} data structure. The authors have implemented tuples in \CFA{}, with a design particularly motivated by two use cases: \emph{multiple-return-value functions} and \emph{variadic functions}.
391
392In standard C, functions can return at most one value. This restriction results in code that emulates functions with multiple return values by \emph{aggregation} or by \emph{aliasing}. In the former situation, the function designer creates a record type that combines all of the return values into a single type. Unfortunately, the designer must come up with a name for the return type and for each of its fields. Unnecessary naming is a common programming language issue, introducing verbosity and a complication of the user's mental model. As such, this technique is effective when used sparingly, but can quickly get out of hand if many functions need to return different combinations of types. In the latter approach, the designer simulates multiple return values by passing the additional return values as pointer parameters. The pointer parameters are assigned inside of the routine body to emulate a return. Using this approach, the caller is directly responsible for allocating storage for the additional temporary return values. This responsibility complicates the call site with a sequence of variable declarations leading up to the call. Also, while a disciplined use of @const@ can give clues about whether a pointer parameter is going to be used as an out parameter, it is not immediately obvious from only the routine signature whether the callee expects such a parameter to be initialized before the call. Furthermore, while many C routines that accept pointers are designed so that it is safe to pass @NULL@ as a parameter, there are many C routines that are not null-safe. On a related note, C does not provide a standard mechanism to state that a parameter is going to be used as an additional return value, which makes the job of ensuring that a value is returned more difficult for the compiler.
393
394C does provide a mechanism for variadic functions through manipulation of @va_list@ objects, but it is notoriously type-unsafe. A variadic function is one that contains at least one parameter, followed by @...@ as the last token in the parameter list. In particular, some form of \emph{argument descriptor} is needed to inform the function of the number of arguments and their types, commonly a format string or counter parameter. It is important to note that both of these mechanisms are inherently redundant, because they require the user to specify information that the compiler knows explicitly. This required repetition is error prone, because it is easy for the user to add or remove arguments without updating the argument descriptor. In addition, C requires the programmer to hard code all of the possible expected types. As a result, it is cumbersome to write a variadic function that is open to extension. For example, consider a simple function that sums $N$ @int@s:
395\begin{lstlisting}
396int sum(int N, ...) {
397  va_list args;
398  va_start(args, N);  // must manually specify last non-variadic argument
399  int ret = 0;
400  while(N) {
401    ret += va_arg(args, int);  // must specify type
402    N--;
403  }
404  va_end(args);
405  return ret;
406}
407
408sum(3, 10, 20, 30);  // must keep initial counter argument in sync
409\end{lstlisting}
410
411The @va_list@ type is a special C data type that abstracts variadic argument manipulation. The @va_start@ macro initializes a @va_list@, given the last named parameter. Each use of the @va_arg@ macro allows access to the next variadic argument, given a type. Since the function signature does not provide any information on what types can be passed to a variadic function, the compiler does not perform any error checks on a variadic call. As such, it is possible to pass any value to the @sum@ function, including pointers, floating-point numbers, and structures. In the case where the provided type is not compatible with the argument's actual type after default argument promotions, or if too many arguments are accessed, the behaviour is undefined \citep{C11}. Furthermore, there is no way to perform the necessary error checks in the @sum@ function at run-time, since type information is not carried into the function body. Since they rely on programmer convention rather than compile-time checks, variadic functions are inherently unsafe.
412
413In practice, compilers can provide warnings to help mitigate some of the problems. For example, GCC provides the @format@ attribute to specify that a function uses a format string, which allows the compiler to perform some checks related to the standard format specifiers. Unfortunately, this attribute does not permit extensions to the format string syntax, so a programmer cannot extend it to warn for mismatches with custom types.
414
415\subsection{Tuple Expressions}
416
417The tuple extensions in \CFA{} can express multiple return values and variadic function parameters in an efficient and type-safe manner. \CFA{} introduces \emph{tuple expressions} and \emph{tuple types}. A tuple expression is an expression producing a fixed-size, ordered list of values of heterogeneous types. The type of a tuple expression is the tuple of the subexpression types, or a \emph{tuple type}. In \CFA{}, a tuple expression is denoted by a comma-separated list of expressions enclosed in square brackets. For example, the expression @[5, 'x', 10.5]@ has type @[int, char, double]@. The previous expression has three \emph{components}. Each component in a tuple expression can be any \CFA{} expression, including another tuple expression. The order of evaluation of the components in a tuple expression is unspecified, to allow a compiler the greatest flexibility for program optimization. It is, however, guaranteed that each component of a tuple expression is evaluated for side-effects, even if the result is not used. Multiple-return-value functions can equivalently be called \emph{tuple-returning functions}.
418
419\CFA{} allows declaration of \emph{tuple variables}, variables of tuple type. For example:
420\begin{lstlisting}
421[int, char] most_frequent(const char*);
422
423const char* str = "hello, world!";
424[int, char] freq = most_frequent(str);
425printf("%s -- %d %c\n", str, freq);
426\end{lstlisting}
427In this example, the type of the @freq@ and the return type of @most_frequent@ are both tuple types. Also of note is how the tuple expression @freq@ is implicitly flattened into separate @int@ and @char@ arguments to @printf@; this code snippet could have been shortened by replacing the last two lines with @printf("%s -- %d %c\n", str, most_frequent(str));@ using exactly the same mechanism.
428
429In addition to variables of tuple type, it is also possible to have pointers to tuples, and arrays of tuples. Tuple types can be composed of any types, except for array types, since arrays are not of fixed size, which makes tuple assignment difficult when a tuple contains an array.
430\begin{lstlisting}
431[double, int] di;
432[double, int] * pdi
433[double, int] adi[10];
434\end{lstlisting}
435This example declares a variable of type @[double, int]@, a variable of type pointer to @[double, int]@, and an array of ten @[double, int]@.
436
437\subsection{Flattening and Restructuring}
438
439In function call contexts, tuples support implicit flattening and restructuring conversions. Tuple flattening recursively expands a tuple into the list of its basic components. Tuple structuring packages a list of expressions into a value of tuple type.
440\begin{lstlisting}
441int f(int, int);
442int g([int, int]);
443int h(int, [int, int]);
444[int, int] x;
445int y;
446
447f(x);      // flatten
448g(y, 10);  // structure
449h(x, y);   // flatten & structure
450\end{lstlisting}
451In \CFA{}, each of these calls is valid. In the call to @f@, @x@ is implicitly flattened so that the components of @x@ are passed as the two arguments to @f@. For the call to @g@, the values @y@ and @10@ are structured into a single argument of type @[int, int]@ to match the type of the parameter of @g@. Finally, in the call to @h@, @y@ is flattened to yield an argument list of length 3, of which the first component of @x@ is passed as the first parameter of @h@, and the second component of @x@ and @y@ are structured into the second argument of type @[int, int]@. The flexible structure of tuples permits a simple and expressive function call syntax to work seamlessly with both single- and multiple-return-value functions, and with any number of arguments of arbitrarily complex structure.
452
453In {K-W C} \citep{Buhr94a,Till89}, a precursor to \CFA{}, there were 4 tuple coercions: opening, closing, flattening, and structuring. Opening coerces a tuple value into a tuple of values, while closing converts a tuple of values into a single tuple value. Flattening coerces a nested tuple into a flat tuple, \ie{} it takes a tuple with tuple components and expands it into a tuple with only non-tuple components. Structuring moves in the opposite direction, \ie{} it takes a flat tuple value and provides structure by introducing nested tuple components.
454
455In \CFA{}, the design has been simplified to require only the two conversions previously described, which trigger only in function call and return situations. Specifically, the expression resolution algorithm examines all of the possible alternatives for an expression to determine the best match. In resolving a function call expression, each combination of function value and list of argument alternatives is examined. Given a particular argument list and function value, the list of argument alternatives is flattened to produce a list of non-tuple valued expressions. Then the flattened list of expressions is compared with each value in the function's parameter list. If the parameter's type is not a tuple type, then the current argument value is unified with the parameter type, and on success the next argument and parameter are examined. If the parameter's type is a tuple type, then the structuring conversion takes effect, recursively applying the parameter matching algorithm using the tuple's component types as the parameter list types. Assuming a successful unification, eventually the algorithm gets to the end of the tuple type, which causes all of the matching expressions to be consumed and structured into a tuple expression. For example, in
456\begin{lstlisting}
457int f(int, [double, int]);
458f([5, 10.2], 4);
459\end{lstlisting}
460There is only a single definition of @f@, and 3 arguments with only single interpretations. First, the argument alternative list @[5, 10.2], 4@ is flattened to produce the argument list @5, 10.2, 4@. Next, the parameter matching algorithm begins, with $P =~$@int@ and $A =~$@int@, which unifies exactly. Moving to the next parameter and argument, $P =~$@[double, int]@ and $A =~$@double@. This time, the parameter is a tuple type, so the algorithm applies recursively with $P' =~$@double@ and $A =~$@double@, which unifies exactly. Then $P' =~$@int@ and $A =~$@double@, which again unifies exactly. At this point, the end of $P'$ has been reached, so the arguments @10.2, 4@ are structured into the tuple expression @[10.2, 4]@. Finally, the end of the parameter list $P$ has also been reached, so the final expression is @f(5, [10.2, 4])@.
461
462\subsection{Member Access}
463
464At times, it is desirable to access a single component of a tuple-valued expression without creating unnecessary temporary variables to assign to. Given a tuple-valued expression @e@ and a compile-time constant integer $i$ where $0 \leq i < n$, where $n$ is the number of components in @e@, @e.i@ accesses the $i$\textsuperscript{th} component of @e@. For example,
465\begin{lstlisting}
466[int, double] x;
467[char *, int] f();
468void g(double, int);
469[int, double] * p;
470
471int y = x.0;  // access int component of x
472y = f().1;  // access int component of f
473p->0 = 5;  // access int component of tuple pointed-to by p
474g(x.1, x.0);  // rearrange x to pass to g
475double z = [x, f()].0.1;  // access second component of first component of tuple expression
476\end{lstlisting}
477As seen above, tuple-index expressions can occur on any tuple-typed expression, including tuple-returning functions, square-bracketed tuple expressions, and other tuple-index expressions, provided the retrieved component is also a tuple. This feature was proposed for {K-W C}, but never implemented \citep[p.~45]{Till89}.
478
479It is possible to access multiple fields from a single expression using a \emph{member-access tuple expression}. The result is a single tuple expression whose type is the tuple of the types of the members. For example,
480\begin{lstlisting}
481struct S { int x; double y; char * z; } s;
482s.[x, y, z];
483\end{lstlisting}
484Here, the type of @s.[x, y, z]@ is @[int, double, char *]@. A member tuple expression has the form @a.[x, y, z];@ where @a@ is an expression with type @T@, where @T@ supports member access expressions, and @x, y, z@ are all members of @T@ with types @T$_x$@, @T$_y$@, and @T$_z$@ respectively. Then the type of @a.[x, y, z]@ is @[T$_x$, T$_y$, T$_z$]@.
485
486Since tuple index expressions are a form of member-access expression, it is possible to use tuple-index expressions in conjunction with member tuple expressions to manually restructure a tuple (\eg{} rearrange components, drop components, duplicate components, etc.):
487\begin{lstlisting}
488[int, int, long, double] x;
489void f(double, long);
490
491f(x.[0, 3]);          // f(x.0, x.3)
492x.[0, 1] = x.[1, 0];  // [x.0, x.1] = [x.1, x.0]
493[long, int, long] y = x.[2, 0, 2];
494\end{lstlisting}
495
496It is possible for a member tuple expression to contain other member access expressions:
497\begin{lstlisting}
498struct A { double i; int j; };
499struct B { int * k; short l; };
500struct C { int x; A y; B z; } v;
501v.[x, y.[i, j], z.k];
502\end{lstlisting}
503This expression is equivalent to @[v.x, [v.y.i, v.y.j], v.z.k]@. That is, the aggregate expression is effectively distributed across the tuple, which allows simple and easy access to multiple components in an aggregate, without repetition. It is guaranteed that the aggregate expression to the left of the @.@ in a member tuple expression is evaluated exactly once. As such, it is safe to use member tuple expressions on the result of a side-effecting function.
504
505\subsection{Tuple Assignment}
506
507In addition to tuple-index expressions, individual components of tuples can be accessed by a \emph{destructuring assignment} which has a tuple expression with lvalue components on its left-hand side. More generally, an assignment where the left-hand side of the assignment operator has a tuple type is called \emph{tuple assignment}. There are two kinds of tuple assignment depending on whether the right-hand side of the assignment operator has a tuple type or a non-tuple type, called \emph{multiple assignment} and \emph{mass assignment}, respectively.
508\begin{lstlisting}
509int x;
510double y;
511[int, double] z;
512[y, x] = 3.14;  // mass assignment
513[x, y] = z;     // multiple assignment
514z = 10;         // mass assignment
515z = [x, y];     // multiple assignment
516\end{lstlisting}
517Let $L_i$ for $i$ in $[0, n)$ represent each component of the flattened left-hand side, $R_i$ represent each component of the flattened right-hand side of a multiple assignment, and $R$ represent the right-hand side of a mass assignment.
518
519For a multiple assignment to be valid, both tuples must have the same number of elements when flattened. Multiple assignment assigns $R_i$ to $L_i$ for each $i$.
520That is, @?=?(&$L_i$, $R_i$)@ must be a well-typed expression. In the previous example, @[x, y] = z@, @z@ is flattened into @z.0, z.1@, and the assignments @x = z.0@ and @y = z.1@ are executed.
521
522A mass assignment assigns the value $R$ to each $L_i$. For a mass assignment to be valid, @?=?(&$L_i$, $R$)@ must be a well-typed expression. This rule differs from C cascading assignment (\eg{} @a=b=c@) in that conversions are applied to $R$ in each individual assignment, which prevents data loss from the chain of conversions that can happen during a cascading assignment. For example, @[y, x] = 3.14@ performs the assignments @y = 3.14@ and @x = 3.14@, which results in the value @3.14@ in @y@ and the value @3@ in @x@. On the other hand, the C cascading assignment @y = x = 3.14@ performs the assignments @x = 3.14@ and @y = x@, which results in the value @3@ in @x@, and as a result the value @3@ in @y@ as well.
523
524Both kinds of tuple assignment have parallel semantics, such that each value on the left side and right side is evaluated \emph{before} any assignments occur. As a result, it is possible to swap the values in two variables without explicitly creating any temporary variables or calling a function:
525\begin{lstlisting}
526int x = 10, y = 20;
527[x, y] = [y, x];
528\end{lstlisting}
529After executing this code, @x@ has the value @20@ and @y@ has the value @10@.
530
531Tuple assignment is an expression where the result type is the type of the left-hand side of the assignment, just like all other assignment expressions in C. This definition allows cascading tuple assignment and use of tuple assignment in other expression contexts, an occasionally useful idiom to keep code succinct and reduce repetition.
532% In \CFA{}, tuple assignment is an expression where the result type is the type of the left-hand side of the assignment, as in normal assignment. That is, a tuple assignment produces the value of the left-hand side after assignment. These semantics allow cascading tuple assignment to work out naturally in any context where a tuple is permitted. These semantics are a change from the original tuple design in {K-W C} \citep{Till89}, wherein tuple assignment was a statement that allows cascading assignments as a special case. This decision was made in an attempt to fix what was seen as a problem with assignment, wherein it can be used in many different locations, such as in function-call argument position. While permitting assignment as an expression does introduce the potential for subtle complexities, it is impossible to remove assignment expressions from \CFA{} without affecting backwards compatibility with C. Furthermore, there are situations where permitting assignment as an expression improves readability by keeping code succinct and reducing repetition, and complicating the definition of tuple assignment puts a greater cognitive burden on the user. In another language, tuple assignment as a statement could be reasonable, but it would be inconsistent for tuple assignment to be the only kind of assignment in \CFA{} that is not an expression.
533
534\subsection{Casting}
535
536In C, the cast operator is used to explicitly convert between types. In \CFA{}, the cast operator has a secondary use as type ascription. That is, a cast can be used to select the type of an expression when it is ambiguous, as in the call to an overloaded function:
537\begin{lstlisting}
538int f();     // (1)
539double f();  // (2)
540
541f();       // ambiguous - (1),(2) both equally viable
542(int)f();  // choose (2)
543\end{lstlisting}
544
545Since casting is a fundamental operation in \CFA{}, casts should be given a meaningful interpretation in the context of tuples. Taking a look at standard C provides some guidance with respect to the way casts should work with tuples:
546\begin{lstlisting}
547int f();
548void g();
549
550(void)f();  // (1)
551(int)g();  // (2)
552\end{lstlisting}
553In C, (1) is a valid cast, which calls @f@ and discards its result. On the other hand, (2) is invalid, because @g@ does not produce a result, so requesting an @int@ to materialize from nothing is nonsensical. Generalizing these principles, any cast wherein the number of components increases as a result of the cast is invalid, while casts that have the same or fewer number of components may be valid.
554
555Formally, a cast to tuple type is valid when $T_n \leq S_m$, where $T_n$ is the number of components in the target type and $S_m$ is the number of components in the source type, and for each $i$ in $[0, n)$, $S_i$ can be cast to $T_i$. Excess elements ($S_j$ for all $j$ in $[n, m)$) are evaluated, but their values are discarded so that they are not included in the result expression. This approach follows naturally from the way that a cast to @void@ works in C.
556
557For example, in
558\begin{lstlisting}
559  [int, int, int] f();
560  [int, [int, int], int] g();
561
562  ([int, double])f();           // (1)
563  ([int, int, int])g();         // (2)
564  ([void, [int, int]])g();      // (3)
565  ([int, int, int, int])g();    // (4)
566  ([int, [int, int, int]])g();  // (5)
567\end{lstlisting}
568
569(1) discards the last element of the return value and converts the second element to @double@. Since @int@ is effectively a 1-element tuple, (2) discards the second component of the second element of the return value of @g@. If @g@ is free of side effects, this expression is equivalent to @[(int)(g().0), (int)(g().1.0), (int)(g().2)]@.
570Since @void@ is effectively a 0-element tuple, (3) discards the first and third return values, which is effectively equivalent to @[(int)(g().1.0), (int)(g().1.1)]@).
571
572Note that a cast is not a function call in \CFA{}, so flattening and structuring conversions do not occur for cast expressions\footnote{User-defined conversions have been considered, but for compatibility with C and the existing use of casts as type ascription, any future design for such conversions would require more precise matching of types than allowed for function arguments and parameters.}. As such, (4) is invalid because the cast target type contains 4 components, while the source type contains only 3. Similarly, (5) is invalid because the cast @([int, int, int])(g().1)@ is invalid. That is, it is invalid to cast @[int, int]@ to @[int, int, int]@.
573
574\subsection{Polymorphism}
575
576Tuples also integrate with \CFA{} polymorphism as a special sort of generic type. Due to the implicit flattening and structuring conversions involved in argument passing, @otype@ and @dtype@ parameters are restricted to matching only with non-tuple types.
577\begin{lstlisting}
578forall(otype T, dtype U)
579void f(T x, U * y);
580
581f([5, "hello"]);
582\end{lstlisting}
583In this example, @[5, "hello"]@ is flattened, so that the argument list appears as @5, "hello"@. The argument matching algorithm binds @T@ to @int@ and @U@ to @const char*@, and calls the function as normal.
584
585Tuples, however, may contain polymorphic components. For example, a plus operator can be written to add two triples of a type together.
586\begin{lstlisting}
587forall(otype T | { T ?+?(T, T); })
588[T, T, T] ?+?([T, T, T] x, [T, T, T] y) {
589  return [x.0+y.0, x.1+y.1, x.2+y.2];
590}
591[int, int, int] x;
592int i1, i2, i3;
593[i1, i2, i3] = x + ([10, 20, 30]);
594\end{lstlisting}
595
596Flattening and restructuring conversions are also applied to tuple types in polymorphic type assertions. Previously in \CFA{}, it has been assumed that assertion arguments must match the parameter type exactly, modulo polymorphic specialization (\ie{} no implicit conversions are applied to assertion arguments). In the example below:
597\begin{lstlisting}
598int f([int, double], double);
599forall(otype T, otype U | { T f(T, U, U); })
600void g(T, U);
601g(5, 10.21);
602\end{lstlisting}
603If assertion arguments must match exactly, then the call to @g@ cannot be resolved, since the expected type of @f@ is flat, while the only @f@ in scope requires a tuple type. Since tuples are fluid, this requirement reduces the usability of tuples in polymorphic code. To ease this pain point, function parameter and return lists are flattened for the purposes of type unification, which allows the previous example to pass expression resolution.
604
605This relaxation is made possible by extending the existing thunk generation scheme, as described by \citet{Bilson03}. Now, whenever a candidate's parameter structure does not exactly match the formal parameter's structure, a thunk is generated to specialize calls to the actual function:
606\begin{lstlisting}
607int _thunk(int _p0, double _p1, double _p2) {
608  return f([_p0, _p1], _p2);
609}
610\end{lstlisting}
611Essentially, this thunk provides flattening and structuring conversions to inferred functions, improving the compatibility of tuples and polymorphism. These thunks take advantage of GCC C nested functions to produce closures that have the usual function pointer signature.
612
613\subsection{Variadic Tuples}
614
615To define variadic functions, \CFA{} adds a new kind of type parameter, @ttype@. Matching against a @ttype@ (``tuple type'') parameter consumes all remaining argument components and packages them into a tuple, binding to the resulting tuple of types. In a given parameter list, there should be at most one @ttype@ parameter that must occur last, otherwise the call can never resolve, given the previous rule. This idea essentially matches normal variadic semantics, with a strong feeling of similarity to \CCeleven{} variadic templates. As such, @ttype@ variables are also referred to as \emph{argument} or \emph{parameter packs} in this paper.
616
617Like variadic templates, the main way to manipulate @ttype@ polymorphic functions is through recursion. Since nothing is known about a parameter pack by default, assertion parameters are key to doing anything meaningful. Unlike variadic templates, @ttype@ polymorphic functions can be separately compiled.
618
619For example, the C @sum@ function at the beginning of Section~\ref{sec:tuples} could be written using @ttype@ as:
620\begin{lstlisting}
621int sum(){ return 0; }        // (0)
622forall(ttype Params | { int sum(Params); })
623int sum(int x, Params rest) { // (1)
624  return x+sum(rest);
625}
626sum(10, 20, 30);
627\end{lstlisting}
628Since (0) does not accept any arguments, it is not a valid candidate function for the call @sum(10, 20, 30)@.
629In order to call (1), @10@ is matched with @x@, and the argument resolution moves on to the argument pack @rest@, which consumes the remainder of the argument list and @Params@ is bound to @[20, 30]@.
630In order to finish the resolution of @sum@, an assertion parameter that matches @int sum(int, int)@ is required.
631Like in the previous iteration, (0) is not a valid candidate, so (1) is examined with @Params@ bound to @[int]@, requiring the assertion @int sum(int)@.
632Next, (0) fails, and to satisfy (1) @Params@ is bound to @[]@, requiring an assertion @int sum()@.
633Finally, (0) matches and (1) fails, which terminates the recursion.
634Effectively, this algorithm traces as @sum(10, 20, 30)@ $\rightarrow$ @10+sum(20, 30)@ $\rightarrow$ @10+(20+sum(30))@ $\rightarrow$ @10+(20+(30+sum()))@ $\rightarrow$ @10+(20+(30+0))@.
635
636As a point of note, this version does not require any form of argument descriptor, since the \CFA{} type system keeps track of all of these details. It might be reasonable to take the @sum@ function a step further to enforce a minimum number of arguments:
637\begin{lstlisting}
638int sum(int x, int y){
639  return x+y;
640}
641forall(ttype Params | { int sum(int, Params); })
642int sum(int x, int y, Params rest) {
643  return sum(x+y, rest);
644}
645\end{lstlisting}
646
647One more iteration permits the summation of any summable type, as long as all arguments are the same type:
648\begin{lstlisting}
649trait summable(otype T) {
650  T ?+?(T, T);
651};
652forall(otype R | summable(R))
653R sum(R x, R y){
654  return x+y;
655}
656forall(otype R, ttype Params
657  | summable(R)
658  | { R sum(R, Params); })
659R sum(R x, R y, Params rest) {
660  return sum(x+y, rest);
661}
662\end{lstlisting}
663Unlike C, it is not necessary to hard code the expected type. This code is naturally open to extension, in that any user-defined type with a @?+?@ operator is automatically able to be used with the @sum@ function. That is to say, the programmer who writes @sum@ does not need full program knowledge of every possible data type, unlike what is necessary to write an equivalent function using the standard C mechanisms. Summing arbitrary heterogeneous lists is possible with similar code by adding the appropriate type variables and addition operators.
664
665It is also possible to write a type-safe variadic print routine which can replace @printf@:
666\begin{lstlisting}
667struct S { int x, y; };
668forall(otype T, ttype Params |
669  { void print(T); void print(Params); })
670void print(T arg, Params rest) {
671  print(arg);
672  print(rest);
673}
674void print(char * x) { printf("%s", x); }
675void print(int x) { printf("%d", x);  }
676void print(S s) { print("{ ", s.x, ",", s.y, " }"); }
677
678print("s = ", (S){ 1, 2 }, "\n");
679\end{lstlisting}
680This example routine showcases a variadic-template-like decomposition of the provided argument list. The individual @print@ routines allow printing a single element of a type. The polymorphic @print@ allows printing any list of types, as long as each individual type has a @print@ function. The individual print functions can be used to build up more complicated @print@ routines, such as for @S@, which is something that cannot be done with @printf@ in C.
681
682It is also possible to use @ttype@ polymorphism to provide arbitrary argument forwarding functions. For example, it is possible to write @new@ as a library function:
683\begin{lstlisting}
684struct Pair(otype R, otype S);
685forall(otype R, otype S)
686void ?{}(Pair(R, S) *, R, S);  // (1)
687
688forall(dtype T, ttype Params | sized(T) | { void ?{}(T *, Params); })
689T * new(Params p) {
690  return ((T*)malloc( sizeof(T) )){ p }; // construct into result of malloc
691}
692
693Pair(int, char) * x = new(42, '!');
694\end{lstlisting}
695The @new@ function provides the combination of type-safe @malloc@ with a constructor call, so that it becomes impossible to forget to construct dynamically allocated objects. This function provides the type-safety of @new@ in \CC{}, without the need to specify the allocated type again, thanks to return-type inference.
696
697In the call to @new@, @Pair(double, char)@ is selected to match @T@, and @Params@ is expanded to match @[double, char]@. The constructor (1) may be specialized to  satisfy the assertion for a constructor with an interface compatible with @void ?{}(Pair(int, char) *, int, char)@.
698
699\TODO{} Check if we actually can use ttype parameters on generic types (if they set the complete flag, it should work, or nearly so).
700
701\subsection{Implementation}
702
703Tuples are implemented in the \CFA{} translator via a transformation into generic types. For each $N$, the first time an $N$-tuple is seen in a scope a generic type with $N$ type parameters is generated. For example:
704\begin{lstlisting}
705[int, int] f() {
706  [double, double] x;
707  [int, double, int] y;
708}
709\end{lstlisting}
710Is transformed into:
711\begin{lstlisting}
712forall(dtype T0, dtype T1 | sized(T0) | sized(T1))
713struct _tuple2 {  // generated before the first 2-tuple
714  T0 field_0;
715  T1 field_1;
716};
717_tuple2(int, int) f() {
718  _tuple2(double, double) x;
719  forall(dtype T0, dtype T1, dtype T2 | sized(T0) | sized(T1) | sized(T2))
720  struct _tuple3 {  // generated before the first 3-tuple
721    T0 field_0;
722    T1 field_1;
723    T2 field_2;
724  };
725  _tuple3_(int, double, int) y;
726}
727\end{lstlisting}
728
729Tuple expressions are then simply converted directly into compound literals:
730\begin{lstlisting}
731[5, 'x', 1.24];
732\end{lstlisting}
733Becomes:
734\begin{lstlisting}
735(_tuple3(int, char, double)){ 5, 'x', 1.24 };
736\end{lstlisting}
737
738Since tuples are essentially structures, tuple indexing expressions are just field accesses:
739\begin{lstlisting}
740void f(int, [double, char]);
741[int, double] x;
742
743x.0+x.1;
744printf("%d %g\n", x);
745f(x, 'z');
746\end{lstlisting}
747Is transformed into:
748\begin{lstlisting}
749void f(int, _tuple2(double, char));
750_tuple2(int, double) x;
751
752x.field_0+x.field_1;
753printf("%d %g\n", x.field_0, x.field_1);
754f(x.field_0, (_tuple2){ x.field_1, 'z' });
755\end{lstlisting}
756Note that due to flattening, @x@ used in the argument position is converted into the list of its fields. In the call to @f@, a the second and third argument components are structured into a tuple argument. Similarly, tuple member expressions are recursively expanded into a list of member access expressions.
757
758Expressions that may contain side effects are made into \emph{unique expressions} before being expanded by the flattening conversion. Each unique expression is assigned an identifier and is guaranteed to be executed exactly once:
759\begin{lstlisting}
760void g(int, double);
761[int, double] h();
762g(h());
763\end{lstlisting}
764Internally, this expression is converted to two variables and an expression:
765\begin{lstlisting}
766void g(int, double);
767[int, double] h();
768
769_Bool _unq0_finished_ = 0;
770[int, double] _unq0;
771g(
772  (_unq0_finished_ ? _unq0 : (_unq0 = f(), _unq0_finished_ = 1, _unq0)).0,
773  (_unq0_finished_ ? _unq0 : (_unq0 = f(), _unq0_finished_ = 1, _unq0)).1,
774);
775\end{lstlisting}
776Since argument evaluation order is not specified by the C programming language, this scheme is built to work regardless of evaluation order. The first time a unique expression is executed, the actual expression is evaluated and the accompanying boolean is true to true. Every subsequent evaluation of the unique expression then results in an access to the stored result of the actual expression. Tuple member expressions also take advantage of unique expressions in the case of possible impurity.
777
778Currently, the \CFA{} translator has a very broad, imprecise definition of impurity, where any function call is assumed to be impure. This notion could be made more precise for certain intrinsic, auto-generated, and builtin functions, and could analyze function bodies when they are available to recursively detect impurity, to eliminate some unique expressions.
779
780The various kinds of tuple assignment, constructors, and destructors generate GNU C statement expressions. A variable is generated to store the value produced by a statement expression, since its fields may need to be constructed with a non-trivial constructor and it may need to be referred to multiple time, \eg{} in a unique expression. The use of statement expressions allows the translator to arbitrarily generate additional temporary variables as needed, but binds the implementation to a non-standard extension of the C language. However, there are other places where the \CFA{} translator makes use of GNU C extensions, such as its use of nested functions, so this restriction is not new.
781
782\section{Related Work}
783
784\CC{} is the existing language it is most natural to compare \CFA{} to, as they are both more modern extensions to C with backwards source compatibility. The most fundamental difference in approach between \CC{} and \CFA{} is their approach to this C compatibility. \CC{} does provide fairly strong source backwards compatibility with C, but is a dramatically more complex language than C, and imposes a steep learning curve to use many of its extension features. For instance, in a break from general C practice, template code is typically written in header files, with a variety of subtle restrictions implied on its use by this choice, while the other polymorphism mechanism made available by \CC{}, class inheritance, requires programmers to learn an entirely new object-oriented programming paradigm; the interaction between templates and inheritance is also quite complex. \CFA{}, by contrast, has a single facility for polymorphic code, one which supports separate compilation and the existing procedural paradigm of C code. A major difference between the approaches of \CC{} and \CFA{} to polymorphism is that the set of assumed properties for a type is \emph{explicit} in \CFA{}. One of the major limiting factors of \CC{}'s approach is that templates cannot be separately compiled, and, until concepts \citep{C++Concepts} are standardized (currently anticipated for \CCtwenty{}), \CC{} provides no way to specify the requirements of a generic function in code beyond compilation errors for template expansion failures. By contrast, the explicit nature of assertions in \CFA{} allows polymorphic functions to be separately compiled, and for their requirements to be checked by the compiler; similarly, \CFA{} generic types may be opaque, unlike \CC{} template classes.
785
786Cyclone also provides capabilities for polymorphic functions and existential types \citep{Gro06}, similar in concept to \CFA{}'s @forall@ functions and generic types. Cyclone existential types can include function pointers in a construct similar to a virtual function table, but these pointers must be explicitly initialized at some point in the code, a tedious and potentially error-prone process. Furthermore, Cyclone's polymorphic functions and types are restricted in that they may only abstract over types with the same layout and calling convention as @void*@, in practice only pointer types and @int@ - in \CFA{} terms, all Cyclone polymorphism must be dtype-static. This design provides the efficiency benefits discussed in Section~\ref{sec:generic-apps} for dtype-static polymorphism, but is more restrictive than \CFA{}'s more general model.
787
788Go and Rust are both modern, compiled languages with abstraction features similar to \CFA{} traits, \emph{interfaces} in Go and \emph{traits} in Rust. However, both languages represent dramatic departures from C in terms of language model, and neither has the same level of compatibility with C as \CFA{}. Go is a garbage-collected language, imposing the associated runtime overhead, and complicating foreign-function calls with the necessity of accounting for data transfer between the managed Go runtime and the unmanaged C runtime. Furthermore, while generic types and functions are available in Go, they are limited to a small fixed set provided by the compiler, with no language facility to define more. Rust is not garbage-collected, and thus has a lighter-weight runtime that is more easily interoperable with C. It also possesses much more powerful abstraction capabilities for writing generic code than Go. On the other hand, Rust's borrow-checker, while it does provide strong safety guarantees, is complex and difficult to learn, and imposes a distinctly idiomatic programming style on Rust. \CFA{}, with its more modest safety features, is significantly easier to port C code to, while maintaining the idiomatic style of the original source.
789
790\section{Conclusion \& Future Work}
791
792In conclusion, the authors' design for generic types and tuples imposes minimal runtime overhead while still supporting a full range of C features, including separately-compiled modules. There is ongoing work on a wide range of \CFA{} feature extensions, including reference types, exceptions, and concurrent programming primitives. In addition to this work, there are some interesting future directions the polymorphism design could take. Notably, \CC{} template functions trade compile time and code bloat for optimal runtime of individual instantiations of polymorphic functions. \CFA{} polymorphic functions, by contrast, use an approach that is essentially dynamic virtual dispatch. The runtime overhead of this approach is low, but not as low as \CC{} template functions, and it may be beneficial to provide a mechanism for particularly performance-sensitive code to close this gap. Further research is needed, but two promising approaches are to allow an annotation on polymorphic function call sites that tells the translator to create a template-specialization of the function (provided the code is visible in the current translation unit) or placing an annotation on polymorphic function definitions that instantiates a version of the polymorphic function specialized to some set of types. These approaches are not mutually exclusive, and would allow these performance optimizations to be applied only where most useful to increase performance, without suffering the code bloat or loss of generality of a template expansion approach where it is unnecessary.
793
794\begin{acks}
795This work is supported in part by a corporate partnership with \grantsponsor{Huawei}{Huawei Ltd.}{http://www.huawei.com}\ and the first author's \grantsponsor{NSERC-PGS}{NSERC PGS D}{http://www.nserc-crsng.gc.ca/Students-Etudiants/PG-CS/BellandPostgrad-BelletSuperieures_eng.asp} scholarship.
796\end{acks}
797
798\bibliographystyle{ACM-Reference-Format}
799\bibliography{generic_types}
800
801\end{document}
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