Changes in / [816d61c:f13ee31]


Ignore:
Files:
6 added
5 deleted
12 edited

Legend:

Unmodified
Added
Removed

  • .gitignore

    r816d61c rf13ee31  
    1313libcfa/Makefile
    1414src/Makefile
    15 version
     15/version
    1616
    1717# genereted by premake

  • doc/proposals/concurrency/Makefile

    r816d61c rf13ee31  
    1313annex/glossary \
    1414text/intro \
     15text/cforall \
    1516text/basics \
    1617text/concurrency \

  • doc/proposals/concurrency/build/bump_ver.sh

    r816d61c rf13ee31  
    11#!/bin/bash
    2 if [ ! -f build/version ]; then
    3     echo "0.0.0" > build/version
     2if [ ! -f version ]; then
     3    echo "0.0.0" > version
    44fi
    55
    6 sed -r 's/([0-9]+\.[0-9]+.)([0-9]+)/echo "\1\$((\2+1))" > version/ge' build/version > /dev/null
     6sed -r 's/([0-9]+\.[0-9]+.)([0-9]+)/echo "\1\$((\2+1))" > version/ge' version > /dev/null

  • doc/proposals/concurrency/text/basics.tex

    r816d61c rf13ee31  
    77
    88\section{Basics of concurrency}
    9 At its core, concurrency is based on having multiple call stacks and potentially multiple threads of execution for these stacks. Concurrency alone without parallelism only requires having multiple call stacks (or contexts) for a single thread of execution and switching between these call stacks on a regular basis. A minimal concurrency product can be achieved by creating coroutines which instead of context switching between each other, always ask an oracle where to context switch next. While coroutines do not technically require a stack, stackfull coroutines are the closest abstraction to a practical "naked"" call stack. When writing concurrency in terms of coroutines, the oracle effectively becomes a scheduler and the whole system now follows a cooperative threading model \cit. The oracle/scheduler can either be a stackless or stackfull entity and correspondingly require one or two context switches to run a different coroutine but in any case a subset of concurrency related challenges start to appear. For the complete set of concurrency challenges to be present, the only feature missing is preemption. Indeed, concurrency challenges appear with the lack of determinism. Guaranteeing mutual-exclusion or synchronisation are simply ways of limiting the lack of determinism in the system. A scheduler introduces order of execution uncertainty while preemption introduces incertainty about when context-switches occur. Now it is important to understand that uncertainty is not necessarily undesireable, uncertainty can often be used by systems to significantly increase performance and is often the basis of giving the user the illusion that hundred of tasks are running in parallel. Optimal performance in concurrent applications is often obtained by having as little determinism as correctness will allow\cit.
     9At its core, concurrency is based on having call-stacks and potentially multiple threads of execution for these stacks. Concurrency without parallelism only requires having multiple call stacks (or contexts) for a single thread of execution, and switching between these call stacks on a regular basis. A minimal concurrency product can be achieved by creating coroutines, which instead of context switching between each other, always ask an oracle where to context switch next. While coroutines do not technically require a stack, stackfull coroutines are the closest abstraction to a practical "naked"" call stack. When writing concurrency in terms of coroutines, the oracle effectively becomes a scheduler and the whole system now follows a cooperative threading-model \cit. The oracle/scheduler can either be a stackless or stackfull entity and correspondingly require one or two context switches to run a different coroutine. In any case, a subset of concurrency related challenges start to appear. For the complete set of concurrency challenges to occur, the only feature missing is preemption. Indeed, concurrency challenges appear with non-determinism. Guaranteeing mutual-exclusion or synchronisation are simply ways of limiting the lack of determinism in a system. A scheduler introduces order of execution uncertainty, while preemption introduces incertainty about where context-switches occur. Now it is important to understand that uncertainty is not necessarily undesireable; uncertainty can often be used by systems to significantly increase performance and is often the basis of giving a user the illusion that tasks are running in parallel. Optimal performance in concurrent applications is often obtained by having as much non-determinism as correctness allows\cit.
    1010
    1111\section{\protect\CFA 's Thread Building Blocks}
    12 % As a system-level language, \CFA should offer both performance and flexibilty as its primary goals, simplicity and user-friendliness being a secondary concern. Therefore, the core of parallelism in \CFA should prioritize power and efficiency. With this said, deconstructing popular paradigms in order to get simple building blocks yields \glspl{uthread} as the core parallelism block. \Glspl{pool} and other parallelism paradigms can then be built on top of the underlying threading model.
    13 One of the important features that is missing to C is threading. On modern architectures, the lack of threading is becoming less and less forgivable\cite{Sutter05, Sutter05b} and therefore any modern programming language should have the proper tools to allow users to write performant concurrent and/or parallel programs. As an extension of C, \CFA needs to express these concepts an a way that is as natural as possible to programmers used to imperative languages. And being a system level language means programmers will expect to be able to choose precisely which features they need and which cost they are willing to pay.
    14 
    15 \section{Coroutines A stepping stone}\label{coroutine}
    16 While the main focus of this proposal is concurrency and parallelism, as mentionned above it is important to adress coroutines which are actually a significant underlying aspect of the concurrency system. Indeed, while having nothing todo with parallelism and arguably little to do with concurrency, coroutines need to deal with context-switchs and and other context management operations. Therefore, this proposal includes coroutines both as an intermediate step for the implementation of threads and a first class feature of \CFA. Furthermore, many design challenges of threads are at least partially present in designing coroutines, which makes the design effort that much more relevant. The core API of coroutines revolve around two features independent call stacks and \code{suspend}/\code{resume}.
     12One of the important features that is missing in C is threading. On modern architectures, a lack of threading is becoming less and less forgivable\cite{Sutter05, Sutter05b}, and therefore modern programming languages must have the proper tools to allow users to write performant concurrent and/or parallel programs. As an extension of C, \CFA needs to express these concepts in a way that is as natural as possible to programmers used to imperative languages. And being a system-level language means programmers expect to choose precisely which features they need and which cost they are willing to pay.
     13
     14\section{Coroutines: A stepping stone}\label{coroutine}
     15While the main focus of this proposal is concurrency and parallelism, as mentionned above it is important to adress coroutines, which are actually a significant underlying aspect of a concurrency system. Indeed, while having nothing todo with parallelism and arguably little to do with concurrency, coroutines need to deal with context-switchs and and other context-management operations. Therefore, this proposal includes coroutines both as an intermediate step for the implementation of threads, and a first class feature of \CFA. Furthermore, many design challenges of threads are at least partially present in designing coroutines, which makes the design effort that much more relevant. The core API of coroutines revolve around two features: independent call stacks and \code{suspend}/\code{resume}.
    1716
    1817Here is an example of a solution to the fibonnaci problem using \CFA coroutines:
    … …  
    2625        }
    2726
     27        // main automacically called on first resume
    2828        void main(Fibonacci* this) {
    2929                int fn1, fn2;           // retained between resumes
    … …  
    5959
    6060\subsection{Construction}
    61 One important design challenge for coroutines and threads (shown in section \ref{threads}) is that the runtime system needs to run some code after the user-constructor runs. In the case of the coroutines this challenge is simpler since there is no loss of determinism brough by preemption or scheduling, however, the underlying challenge remains the same for coroutines and threads.
    62 
    63 The runtime system needs to create the coroutine's stack and more importantly prepare it for the first resumption. The timing of the creation is non trivial since users both expect to have fully constructed objects once execution enters the coroutine main and to be able to resume the coroutine from the constructor (Obviously we only solve cases where these two statements don't conflict). There are several solutions to this problem but the chosen options effectively forces the design of the coroutine.
    64 
    65 Furthermore, \CFA faces an extra challenge which is that polymorphique routines rely on invisible thunks when casted to non-polymorphic routines and these thunks have function scope. For example, the following code, while looking benign, can run into undefined behaviour because of thunks:
     61One important design challenge for coroutines and threads (shown in section \ref{threads}) is that the runtime system needs to run code after the user-constructor runs. In the case of coroutines, this challenge is simpler since there is no non-determinism from preemption or scheduling. However, the underlying challenge remains the same for coroutines and threads.
     62
     63The runtime system needs to create the coroutine's stack and more importantly prepare it for the first resumption. The timing of the creation is non-trivial since users both expect to have fully constructed objects once execution enters the coroutine main and to be able to resume the coroutine from the constructor. Like for regular objects, constructors can still leak coroutines before they are ready. There are several solutions to this problem but the chosen options effectively forces the design of the coroutine.
     64
     65Furthermore, \CFA faces an extra challenge as polymorphic routines create invisible thunks when casted to non-polymorphic routines and these thunks have function scope. For example, the following code, while looking benign, can run into undefined behaviour because of thunks:
    6666
    6767\begin{cfacode}
    … …  
    7878}
    7979\end{cfacode}
    80 Indeed, the generated C code\footnote{Code trimmed down for brevity} shows that a local thunk is created in order to hold type information:
     80The generated C code\footnote{Code trimmed down for brevity} creates a local thunk to hold type information:
    8181
    8282\begin{ccode}
    … …  
    9595}
    9696\end{ccode}
    97 The problem in the this example is that there is a race condition between the start of the execution of \code{noop} on the other thread and the stack frame of \code{bar} being destroyed. This extra challenge limits which solutions are viable because storing the function pointer for too long only increases the chances that the race will end in undefined behavior; i.e. the stack based thunk being destroyed before it was used.
     97The problem in this example is a race condition between the start of the execution of \code{noop} on the other thread and the stack frame of \code{bar} being destroyed. This extra challenge limits which solutions are viable because storing the function pointer for too long only increases the chances that the race will end in undefined behavior; i.e. the stack based thunk being destroyed before it was used. This challenge is an extension of challenges that come with second-class routines. Indeed, GCC nested routines also have the limitation that the routines cannot be passed outside of the scope of the functions these were declared in. The case of coroutines and threads is simply an extension of this problem to multiple call-stacks.
    9898
    9999\subsection{Alternative: Composition}
    100 One solution to this challenge would be to use inheritence,
     100One solution to this challenge would be to use composition/containement,
    101101
    102102\begin{cfacode}
    103103        struct Fibonacci {
    104104              int fn; // used for communication
    105               coroutine c;
     105              coroutine c; //composition
    106106        };
    107107
    … …  
    111111        }
    112112\end{cfacode}
    113 
    114 There are two downsides to this approach. The first, which is relatively minor, is that the base class needs to be made aware of the main routine pointer, regardless of whether we use a parameter or a virtual pointer, this means the coroutine data must be made larger to store a value that is actually a compile time constant (The address of the main routine). The second problem which is both subtle but significant, is that now users can get the initialisation order of there coroutines wrong. Indeed, every field of a \CFA struct will be constructed but in the order of declaration, unless users explicitly write otherwise. This means that users who forget to initialize a the coroutine at the right time may resume the coroutine with an uninitilized object. For coroutines, this is unlikely to be a problem, for threads however, this is a significant problem.
     113There are two downsides to this approach. The first, which is relatively minor, is that the base class needs to be made aware of the main routine pointer, regardless of whether a parameter or a virtual pointer is used, this means the coroutine data must be made larger to store a value that is actually a compile time constant (address of the main routine). The second problem, which is both subtle and significant, is that now users can get the initialisation order of there coroutines wrong. Indeed, every field of a \CFA struct is constructed but in declaration order, unless users explicitly write otherwise. This semantics means that users who forget to initialize a the coroutine may resume the coroutine with an uninitilized object. For coroutines, this is unlikely to be a problem, for threads however, this is a significant problem.
    115114
    116115\subsection{Alternative: Reserved keyword}
    … …  
    122121        };
    123122\end{cfacode}
    124 
    125123This mean the compiler can solve problems by injecting code where needed. The downside of this approach is that it makes coroutine a special case in the language. Users who would want to extend coroutines or build their own for various reasons can only do so in ways offered by the language. Furthermore, implementing coroutines without language supports also displays the power of \CFA.
    126124While this is ultimately the option used for idiomatic \CFA code, coroutines and threads can both be constructed by users without using the language support. The reserved keywords are only present to improve ease of use for the common cases.
    … …  
    128126\subsection{Alternative: Lamda Objects}
    129127
    130 For coroutines as for threads, many implementations are based on routine pointers or function objects\cit. For example, Boost implements coroutines in terms of four functor object types \code{asymmetric_coroutine<>::pull_type}, \code{asymmetric_coroutine<>::push_type}, \code{symmetric_coroutine<>::call_type}, \code{symmetric_coroutine<>::yield_type}. Often, the canonical threading paradigm in languages is based on function pointers, pthread being one of the most well known example. The main problem of these approach is that the thread usage is limited to a generic handle that must otherwise be wrapped in a custom type. Since the custom type is simple to write and \CFA and solves several issues, added support for routine/lambda based coroutines adds very little.
    131 
    132 \subsection{Trait based coroutines}
    133 
    134 Finally the underlying approach, which is the one closest to \CFA idioms, is to use trait-based lazy coroutines. This approach defines a coroutine as \say{anything that \say{satisfies the trait \code{is_coroutine} and is used as a coroutine} is a coroutine}.
     128For coroutines as for threads, many implementations are based on routine pointers or function objects\cit. For example, Boost implements coroutines in terms of four functor object types:
     129\begin{cfacode}
     130asymmetric_coroutine<>::pull_type
     131asymmetric_coroutine<>::push_type
     132symmetric_coroutine<>::call_type
     133symmetric_coroutine<>::yield_type
     134\end{cfacode}
     135Often, the canonical threading paradigm in languages is based on function pointers, pthread being one of the most well known examples. The main problem of this approach is that the thread usage is limited to a generic handle that must otherwise be wrapped in a custom type. Since the custom type is simple to write in \CFA and solves several issues, added support for routine/lambda based coroutines adds very little.
     136
     137A variation of this would be to use an simple function pointer in the same way pthread does for threads :
     138\begin{cfacode}
     139void foo( coroutine_t cid, void * arg ) {
     140        int * value = (int *)arg;
     141        //Coroutine body
     142}
     143
     144int main() {
     145        int value = 0;
     146        coroutine_t cid = coroutine_create( &foo, (void*)&value );
     147        coroutine_resume( &cid );
     148}
     149\end{cfacode}
     150This semantic is more common for thread interfaces than coroutines but would work equally well. As discussed in section \ref{threads}, this approach is superseeded by static approaches in terms of expressivity.
     151
     152\subsection{Alternative: Trait-based coroutines}
     153
     154Finally the underlying approach, which is the one closest to \CFA idioms, is to use trait-based lazy coroutines. This approach defines a coroutine as anything that satisfies the trait \code{is_coroutine} and is used as a coroutine is a coroutine.
    135155
    136156\begin{cfacode}
    … …  
    140160};
    141161\end{cfacode}
    142 
    143 This entails that an object is not a coroutine until \code{resume} (or \code{prime}) is called on the object. Correspondingly, any object that is passed to \code{resume} is a coroutine since it must satisfy the \code{is_coroutine} trait to compile. The advantage of this approach is that users can easily create different types of coroutines, for example, changing the memory foot print of a coroutine is trivial when implementing the \code{get_coroutine} routine. The \CFA keyword \code{coroutine} only has the effect of implementing the getter and forward declarations required for users to only have to implement the main routine.
     162This ensures an object is not a coroutine until \code{resume} (or \code{prime}) is called on the object. Correspondingly, any object that is passed to \code{resume} is a coroutine since it must satisfy the \code{is_coroutine} trait to compile. The advantage of this approach is that users can easily create different types of coroutines, for example, changing the memory foot print of a coroutine is trivial when implementing the \code{get_coroutine} routine. The \CFA keyword \code{coroutine} only has the effect of implementing the getter and forward declarations required for users to only have to implement the main routine.
     163
     164\begin{center}
     165\begin{tabular}{c c c}
     166\begin{cfacode}[tabsize=3]
     167coroutine MyCoroutine {
     168        int someValue;
     169};
     170\end{cfacode} & == & \begin{cfacode}[tabsize=3]
     171struct MyCoroutine {
     172        int someValue;
     173        coroutine_desc __cor;
     174};
     175
     176static inline
     177coroutine_desc * get_coroutine(
     178        struct MyCoroutine * this
     179) {
     180        return &this->__cor;
     181}
     182
     183void main(struct MyCoroutine * this);
     184\end{cfacode}
     185\end{tabular}
     186\end{center}
     187
    144188
    145189
    146190\section{Thread Interface}\label{threads}
    147 The basic building blocks of multi-threading in \CFA are \glspl{cfathread}. By default these are implemented as \glspl{uthread}, and as such, offer a flexible and lightweight threading interface (lightweight compared to \glspl{kthread}). A thread can be declared using a SUE declaration \code{thread} as follows:
     191The basic building blocks of multi-threading in \CFA are \glspl{cfathread}. Both use and kernel threads are supported, where user threads are the concurrency mechanism and kernel threads are the parallel mechanism. User threads offer a flexible and lightweight interface. A thread can be declared using a struct declaration \code{thread} as follows:
    148192
    149193\begin{cfacode}
    … …  
    151195\end{cfacode}
    152196
    153 Like for coroutines, the keyword is a thin wrapper arount a \CFA trait:
     197As for coroutines, the keyword is a thin wrapper arount a \CFA trait:
    154198
    155199\begin{cfacode}
    … …  
    170214\end{cfacode}
    171215
    172 In this example, threads of type \code{foo} will start there execution in the \code{void main(foo*)} routine which in this case prints \code{"Hello World!"}. While this proposoal encourages this approach which enforces strongly type programming, users may prefer to use the routine based thread semantics for the sake of simplicity. With these semantics it is trivial to write a thread type that takes a function pointer as parameter and executes it on its stack asynchronously
     216In this example, threads of type \code{foo} start execution in the \code{void main(foo*)} routine which prints \code{"Hello World!"}. While this proposoal encourages this approach to enforce strongly-typed programming, users may prefer to use the routine based thread semantics for the sake of simplicity. With these semantics it is trivial to write a thread type that takes a function pointer as parameter and executes it on its stack asynchronously
    173217\begin{cfacode}
    174218        typedef void (*voidFunc)(void);
    … …  
    201245void main() {
    202246        World w;
    203         //Thread run forks here
    204 
    205         //Printing "Hello " and "World!" will be run concurrently
     247        //Thread forks here
     248
     249        //Printing "Hello " and "World!" are run concurrently
    206250        sout | "Hello " | endl;
    207251
    … …  
    210254\end{cfacode}
    211255
    212 This semantic has several advantages over explicit semantics typesafety is guaranteed, a thread is always started and stopped exaclty once and users cannot make any progamming errors. However, one of the apparent drawbacks of this system is that threads now always form a lattice, that is they are always destroyed in opposite order of construction. While this seems like a significant limitation, existing \CFA semantics can solve this problem. Indeed, using dynamic allocation to create threads will naturally let threads outlive the scope in which the thread was created much like dynamically allocating memory will let objects outlive the scope in which thy were created
     256This semantic has several advantages over explicit semantics typesafety is guaranteed, a thread is always started and stopped exaclty once and users cannot make any progamming errors. Another advantage of this semantic is that it naturally scale to multiple threads meaning basic synchronisation is very simple
     257
     258\begin{cfacode}
     259        thread MyThread {
     260                //...
     261        };
     262
     263        //main
     264        void main(MyThread* this) {
     265                //...
     266        }
     267
     268        void foo() {
     269                MyThread thrds[10];
     270                //Start 10 threads at the beginning of the scope
     271
     272                DoStuff();
     273
     274                //Wait for the 10 threads to finish
     275        }
     276\end{cfacode}
     277
     278However, one of the apparent drawbacks of this system is that threads now always form a lattice, that is they are always destroyed in opposite order of construction because of block structure. However, storage allocation os not limited to blocks; dynamic allocation can create threads that outlive the scope in which the thread is created much like dynamically allocating memory lets objects outlive the scope in which they are created
    213279
    214280\begin{cfacode}
    … …  
    241307        }
    242308\end{cfacode}
    243 
    244 Another advantage of this semantic is that it naturally scale to multiple threads meaning basic synchronisation is very simple
    245 
    246 \begin{cfacode}
    247         thread MyThread {
    248                 //...
    249         };
    250 
    251         //main
    252         void main(MyThread* this) {
    253                 //...
    254         }
    255 
    256         void foo() {
    257                 MyThread thrds[10];
    258                 //Start 10 threads at the beginning of the scope
    259 
    260                 DoStuff();
    261 
    262                 //Wait for the 10 threads to finish
    263         }
    264 \end{cfacode}

  • doc/proposals/concurrency/text/concurrency.tex

    r816d61c rf13ee31  
    44% ======================================================================
    55% ======================================================================
    6 Several tool can be used to solve concurrency challenges. Since many of these challenges appear with the use of mutable shared-state, some languages and libraries simply disallow mutable shared-state (Erlang~\cite{Erlang}, Haskell~\cite{Haskell}, Akka (Scala)~\cite{Akka}). In these paradigms, interaction among concurrent objects relies on message passing~\cite{Thoth,Harmony,V-Kernel} or other paradigms that closely relate to networking concepts (channels\cit for example). However, in languages that use routine calls as their core abstraction-mechanism, these approaches force a clear distinction between concurrent and non-concurrent paradigms (i.e., message passing versus routine call). This distinction in turn means that, in order to be effective, programmers need to learn two sets of designs patterns. This distinction can be hidden away in library code, effective use of the librairy still has to take both paradigms into account. Approaches based on shared memory are more closely related to non-concurrent paradigms since they often rely on basic constructs like routine calls and shared objects. At a lower level, non-concurrent paradigms are often implemented as locks and atomic operations. Many such mechanisms have been proposed, including semaphores~\cite{Dijkstra68b} and path expressions~\cite{Campbell74}. However, for productivity reasons it is desireable to have a higher-level construct be the core concurrency paradigm~\cite{HPP:Study}. An approach that is worth mentionning because it is gaining in popularity is transactionnal memory~\cite{Dice10}[Check citation]. While this approach is even pursued by system languages like \CC\cit, the performance and feature set is currently too restrictive to add such a paradigm to a language like C or \CC\cit, which is why it was rejected as the core paradigm for concurrency in \CFA. One of the most natural, elegant, and efficient mechanisms for synchronization and communication, especially for shared memory systems, is the \emph{monitor}. Monitors were first proposed by Brinch Hansen~\cite{Hansen73} and later described and extended by C.A.R.~Hoare~\cite{Hoare74}. Many programming languages---e.g., Concurrent Pascal~\cite{ConcurrentPascal}, Mesa~\cite{Mesa}, Modula~\cite{Modula-2}, Turing~\cite{Turing:old}, Modula-3~\cite{Modula-3}, NeWS~\cite{NeWS}, Emerald~\cite{Emerald}, \uC~\cite{Buhr92a} and Java~\cite{Java}---provide monitors as explicit language constructs. In addition, operating-system kernels and device drivers have a monitor-like structure, although they often use lower-level primitives such as semaphores or locks to simulate monitors. For these reasons, this project proposes monitors as the core concurrency-construct.
     6Several tool can be used to solve concurrency challenges. Since many of these challenges appear with the use of mutable shared-state, some languages and libraries simply disallow mutable shared-state (Erlang~\cite{Erlang}, Haskell~\cite{Haskell}, Akka (Scala)~\cite{Akka}). In these paradigms, interaction among concurrent objects relies on message passing~\cite{Thoth,Harmony,V-Kernel} or other paradigms that closely relate to networking concepts (channels\cit for example). However, in languages that use routine calls as their core abstraction-mechanism, these approaches force a clear distinction between concurrent and non-concurrent paradigms (i.e., message passing versus routine call). This distinction in turn means that, in order to be effective, programmers need to learn two sets of designs patterns. While this distinction can be hidden away in library code, effective use of the librairy still has to take both paradigms into account.
     7
     8Approaches based on shared memory are more closely related to non-concurrent paradigms since they often rely on basic constructs like routine calls and shared objects. At the lowest level, concurrent paradigms are implemented as atomic operations and locks. Many such mechanisms have been proposed, including semaphores~\cite{Dijkstra68b} and path expressions~\cite{Campbell74}. However, for productivity reasons it is desireable to have a higher-level construct be the core concurrency paradigm~\cite{HPP:Study}.
     9
     10An approach that is worth mentionning because it is gaining in popularity is transactionnal memory~\cite{Dice10}[Check citation]. While this approach is even pursued by system languages like \CC\cit, the performance and feature set is currently too restrictive to be the main concurrency paradigm for general purpose language, which is why it was rejected as the core paradigm for concurrency in \CFA.
     11
     12One of the most natural, elegant, and efficient mechanisms for synchronization and communication, especially for shared memory systems, is the \emph{monitor}. Monitors were first proposed by Brinch Hansen~\cite{Hansen73} and later described and extended by C.A.R.~Hoare~\cite{Hoare74}. Many programming languages---e.g., Concurrent Pascal~\cite{ConcurrentPascal}, Mesa~\cite{Mesa}, Modula~\cite{Modula-2}, Turing~\cite{Turing:old}, Modula-3~\cite{Modula-3}, NeWS~\cite{NeWS}, Emerald~\cite{Emerald}, \uC~\cite{Buhr92a} and Java~\cite{Java}---provide monitors as explicit language constructs. In addition, operating-system kernels and device drivers have a monitor-like structure, although they often use lower-level primitives such as semaphores or locks to simulate monitors. For these reasons, this project proposes monitors as the core concurrency-construct.
    713
    814\section{Basics}
    9 The basic features that concurrency tools neet to offer is support for mutual-exclusion and synchronisation. Mutual-exclusion is the concept that only a fixed number of threads can access a critical section at any given time, where a critical section is the group of instructions on an associated portion of data that requires the limited access. On the other hand, synchronization enforces relative ordering of execution and synchronization tools are used to guarantee that event \textit{X} always happens before \textit{Y}.
     15Non-determinism requires concurrent systems to offer support for mutual-exclusion and synchronisation. Mutual-exclusion is the concept that only a fixed number of threads can access a critical section at any given time, where a critical section is a group of instructions on an associated portion of data that requires the restricted access. On the other hand, synchronization enforces relative ordering of execution and synchronization tools numerous mechanisms to establish timing relationships among threads.
    1016
    1117\subsection{Mutual-Exclusion}
    12 As mentionned above, mutual-exclusion is the guarantee that only a fix number of threads can enter a critical section at once. However, many solution exists for mutual exclusion which vary in terms of performance, flexibility and ease of use. Methods range from low level locks, which are fast and flexible but require significant attention to be correct, to  higher level mutual-exclusion methods, which sacrifice some performance in order to improve ease of use. Often by either guaranteeing some problems cannot occur (e.g. being deadlock free) or by offering a more explicit coupling between data and corresponding critical section. For example, the \CC \code{std::atomic<T>} which offer an easy way to express mutual-exclusion on a restricted set of features (.e.g: reading/writing large types atomically). Another challenge with low level locks is composability. Locks are said to not be composable because it takes careful organising for multiple locks to be used and once while preventing deadlocks. Easing composability is another feature higher-level mutual-exclusion mechanisms often offer.
     18As mentionned above, mutual-exclusion is the guarantee that only a fix number of threads can enter a critical section at once. However, many solution exists for mutual exclusion which vary in terms of performance, flexibility and ease of use. Methods range from low-level locks, which are fast and flexible but require significant attention to be correct, to  higher-level mutual-exclusion methods, which sacrifice some performance in order to improve ease of use. Ease of use comes by either guaranteeing some problems cannot occur (e.g., being deadlock free) or by offering a more explicit coupling between data and corresponding critical section. For example, the \CC \code{std::atomic<T>} which offer an easy way to express mutual-exclusion on a restricted set of operations (.e.g: reading/writing large types atomically). Another challenge with low-level locks is composability. Locks are not composable because it takes careful organising for multiple locks to be used while preventing deadlocks. Easing composability is another feature higher-level mutual-exclusion mechanisms often offer.
    1319
    1420\subsection{Synchronization}
    15 As for mutual-exclusion, low level synchronisation primitive often offer great performance and good flexibility at the cost of ease of use. Again, higher-level mechanism often simplify usage by adding better coupling between synchronization and data, for example message passing, or offering simple solution to otherwise involved challenges. An example of this is barging. As mentionned above synchronization can be expressed as guaranteeing that event \textit{X} always happens before \textit{Y}. Most of the time synchronisation happens around a critical section, where threads most acquire said critical section in a certain order. However, it may also be desired to be able to guarantee that event \textit{Z} does not occur between \textit{X} and \textit{Y}. This is called barging, where event \textit{X} tries to effect event \textit{Y} but anoter thread races to grab the critical section and emits \textit{Z} before \textit{Y}. Preventing or detecting barging is an involved challenge with low-level locks, which can be made much easier by higher-level constructs.
     21As for mutual-exclusion, low level synchronisation primitive often offer good performance and good flexibility at the cost of ease of use. Again, higher-level mechanism often simplify usage by adding better coupling between synchronization and data, .eg., message passing, or offering simple solution to otherwise involved challenges. An example of this is barging. As mentionned above synchronization can be expressed as guaranteeing that event \textit{X} always happens before \textit{Y}. Most of the time synchronisation happens around a critical section, where threads most acquire said critical section in a certain order. However, it may also be desired to be able to guarantee that event \textit{Z} does not occur between \textit{X} and \textit{Y}. This is called barging, where event \textit{X} tries to effect event \textit{Y} but anoter thread races to grab the critical section and emits \textit{Z} before \textit{Y}. Preventing or detecting barging is an involved challenge with low-level locks, which can be made much easier by higher-level constructs.
    1622
    1723% ======================================================================
    … …  
    2026% ======================================================================
    2127% ======================================================================
    22 A monitor is a set of routines that ensure mutual exclusion when accessing shared state. This concept is generally associated with Object-Oriented Languages like Java~\cite{Java} or \uC~\cite{uC++book} but does not strictly require OOP semantics. The only requirements is the ability to declare a handle to a shared object and a set of routines that act on it :
     28A monitor is a set of routines that ensure mutual exclusion when accessing shared state. This concept is generally associated with Object-Oriented Languages like Java~\cite{Java} or \uC~\cite{uC++book} but does not strictly require OO semantics. The only requirements is the ability to declare a handle to a shared object and a set of routines that act on it :
    2329\begin{cfacode}
    2430        typedef /*some monitor type*/ monitor;
    … …  
    3642% ======================================================================
    3743% ======================================================================
    38 The above monitor example displays some of the intrinsic characteristics. Indeed, it is necessary to use pass-by-reference over pass-by-value for monitor routines. This semantics is important because at their core, monitors are implicit mutual-exclusion objects (locks), and these objects cannot be copied. Therefore, monitors are implicitly non-copyable.
    39 
    40 Another aspect to consider is when a monitor acquires its mutual exclusion. For example, a monitor may need to be passed through multiple helper routines that do not acquire the monitor mutual-exclusion on entry. Pass through can be both generic helper routines (\code{swap}, \code{sort}, etc.) or specific helper routines like the following to implement an atomic counter :
     44The above monitor example displays some of the intrinsic characteristics. First, it is necessary to use pass-by-reference over pass-by-value for monitor routines. This semantics is important because at their core, monitors are implicit mutual-exclusion objects (locks), and these objects cannot be copied. Therefore, monitors are implicitly non-copyable objects.
     45
     46Another aspect to consider is when a monitor acquires its mutual exclusion. For example, a monitor may need to be passed through multiple helper routines that do not acquire the monitor mutual-exclusion on entry. Pass through can occur for generic helper routines (\code{swap}, \code{sort}, etc.) or specific helper routines like the following to implement an atomic counter :
    4147
    4248\begin{cfacode}
    … …  
    4652        size_t ++?(counter_t & mutex this); //increment
    4753
    48         //need for mutex is platform dependent here
     54        //need for mutex is platform dependent
    4955        void ?{}(size_t * this, counter_t & mutex cnt); //conversion
    5056\end{cfacode}
    … …  
    5258Here, the constructor(\code{?\{\}}) uses the \code{nomutex} keyword to signify that it does not acquire the monitor mutual-exclusion when constructing. This semantics is because an object not yet constructed should never be shared and therefore does not require mutual exclusion. The prefix increment operator uses \code{mutex} to protect the incrementing process from race conditions. Finally, there is a conversion operator from \code{counter_t} to \code{size_t}. This conversion may or may not require the \code{mutex} keyword depending on whether or not reading an \code{size_t} is an atomic operation.
    5359
    54 Having both \code{mutex} and \code{nomutex} keywords could be argued to be redundant based on the meaning of a routine having neither of these keywords. For example, given a routine without qualifiers \code{void foo(counter_t & this)} then it is reasonable that it should default to the safest option \code{mutex}. On the other hand, the option of having routine \code{void foo(counter_t & this)} mean \code{nomutex} is unsafe by default and may easily cause subtle errors. In fact \code{nomutex} is the "normal" parameter behaviour, with the \code{nomutex} keyword effectively stating explicitly that "this routine is not special". Another alternative is to make having exactly one of these keywords mandatory, which would provide the same semantics but without the ambiguity of supporting routines neither keyword. Mandatory keywords would also have the added benefit of being self-documented but at the cost of extra typing. While there are several benefits to mandatory keywords, they do bring a few challenges. Mandatory keywords in \CFA would imply that the compiler must know without a doubt wheter or not a parameter is a monitor or not. Since \CFA relies heavily on traits as an abstraction mechanism, the distinction between a type that is a monitor and a type that looks like a monitor can become blurred. For this reason, \CFA only has the \code{mutex} keyword.
     60Having both \code{mutex} and \code{nomutex} keywords is redundant based on the meaning of a routine having neither of these keywords. For example, given a routine without qualifiers \code{void foo(counter_t & this)}, then it is reasonable that it should default to the safest option \code{mutex}, whereas assuming \code{nomutex} is unsafe and may cause subtle errors. In fact, \code{nomutex} is the "normal" parameter behaviour, with the \code{nomutex} keyword effectively stating explicitly that "this routine is not special". Another alternative is to make having exactly one of these keywords mandatory, which would provide the same semantics but without the ambiguity of supporting routines neither keyword. Mandatory keywords would also have the added benefit of being self-documented but at the cost of extra typing. While there are several benefits to mandatory keywords, they do bring a few challenges. Mandatory keywords in \CFA would imply that the compiler must know without a doubt wheter or not a parameter is a monitor or not. Since \CFA relies heavily on traits as an abstraction mechanism, the distinction between a type that is a monitor and a type that looks like a monitor can become blurred. For this reason, \CFA only has the \code{mutex} keyword.
    5561
    5662
    … …  
    6066int f2(const monitor & mutex m);
    6167int f3(monitor ** mutex m);
    62 int f4(monitor *[] mutex m);
     68int f4(monitor * mutex m []);
    6369int f5(graph(monitor*) & mutex m);
    6470\end{cfacode}
    … …  
    6874int f1(monitor & mutex m);   //Okay : recommanded case
    6975int f2(monitor * mutex m);   //Okay : could be an array but probably not
    70 int f3(monitor [] mutex m);  //Not Okay : Array of unkown length
     76int f3(monitor mutex m []);  //Not Okay : Array of unkown length
    7177int f4(monitor ** mutex m);  //Not Okay : Could be an array
    72 int f5(monitor *[] mutex m); //Not Okay : Array of unkown length
     78int f5(monitor * mutex m []); //Not Okay : Array of unkown length
    7379\end{cfacode}
    7480

  • doc/proposals/concurrency/text/intro.tex

    r816d61c rf13ee31  
    33% ======================================================================
    44
    5 This proposal provides a minimal concurrency API that is simple, efficient and can be reused to build higher-level features. The simplest possible concurrency core is a thread and a lock but this low-level approach is hard to master. An easier approach for users is to support higher-level constructs as the basis of the concurrency in \CFA. Indeed, for highly productive parallel programming, high-level approaches are much more popular~\cite{HPP:Study}. Examples are task based, message passing and implicit threading.
     5This proposal provides a minimal concurrency API that is simple, efficient and can be reused to build higher-level features. The simplest possible concurrency system is a thread and a lock but this low-level approach is hard to master. An easier approach for users is to support higher-level constructs as the basis of the concurrency, in \CFA. Indeed, for highly productive parallel programming, high-level approaches are much more popular~\cite{HPP:Study}. Examples are task based, message passing and implicit threading. Therefore a high-level approach is adapted in \CFA
    66
    7 There are actually two problems that need to be solved in the design of concurrency for a programming language: which concurrency tools are available to the users and which parallelism tools are available. While these two concepts are often seen together, they are in fact distinct concepts that require different sorts of tools~\cite{Buhr05a}. Concurrency tools need to handle mutual exclusion and synchronization, while parallelism tools are about performance, cost and resource utilization.
     7There are actually two problems that need to be solved in the design of concurrency for a programming language: which concurrency and which parallelism tools are available to the users. While these two concepts are often combined, they are in fact distinct concepts that require different tools~\cite{Buhr05a}. Concurrency tools need to handle mutual exclusion and synchronization, while parallelism tools are about performance, cost and resource utilization.

  • doc/proposals/concurrency/thesis.tex

    r816d61c rf13ee31  
    7777\fancyhf{}
    7878\cfoot{\thepage}
    79 \rfoot{v\input{build/version}}
     79\rfoot{v\input{version}}
    8080
    8181%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%%
    … …  
    9494
    9595\input{intro}
     96
     97\input{cforall}
    9698
    9799\input{basics}

  • doc/working/exception/translate.c

    r816d61c rf13ee31  
    5454
    5555__throw_resume(exception_instance);
     56
     57
     58
     59// Rethrows (inside matching handlers):
     60"Cforall"
     61
     62throw;
     63
     64resume;
     65
     66"C"
     67
     68__rethrow_terminate();
     69
     70return false;
    5671
    5772
    … …  
    237252                }
    238253                void finally1() {
    239                         // (Finally, because of timing, also work for resume.)
     254                        // Finally, because of timing, also works for resume.
     255                        // However this might not actually be better in any way.
    240256                        __try_resume_cleanup();
    241257

  • src/Common/PassVisitor.h

    r816d61c rf13ee31  
    5454        virtual void visit( BranchStmt *branchStmt ) override final;
    5555        virtual void visit( ReturnStmt *returnStmt ) override final;
     56        virtual void visit( ThrowStmt *throwStmt ) override final;
    5657        virtual void visit( TryStmt *tryStmt ) override final;
    5758        virtual void visit( CatchStmt *catchStmt ) override final;
    … …  
    139140        virtual Statement* mutate( BranchStmt *branchStmt ) override final;
    140141        virtual Statement* mutate( ReturnStmt *returnStmt ) override final;
     142        virtual Statement* mutate( ThrowStmt *throwStmt ) override final;
    141143        virtual Statement* mutate( TryStmt *returnStmt ) override final;
    142144        virtual Statement* mutate( CatchStmt *catchStmt ) override final;
    … …  
    230232        std::list< Statement* > *       get_afterStmts () { return stmtsToAddAfter_impl ( pass, 0); }
    231233        bool visit_children() { bool* skip = skip_children_impl(pass, 0); return ! (skip && *skip); }
     234        void reset_visit() { bool* skip = skip_children_impl(pass, 0); if(skip) *skip = false; }
     235
     236        guard_value_impl init_guard() {
     237                guard_value_impl guard;
     238                auto at_cleanup = at_cleanup_impl(pass, 0);
     239                if( at_cleanup ) {
     240                        *at_cleanup = [&guard]( cleanup_func_t && func, void* val ) {
     241                                guard.push( std::move( func ), val );
     242                        };
     243                }
     244                return guard;
     245        }
    232246};
    233247
     248template<typename pass_type, typename T>
     249void GuardValue( pass_type * pass, T& val ) {
     250        pass->at_cleanup( [ val ]( void * newVal ) {
     251                * static_cast< T * >( newVal ) = val;
     252        }, static_cast< void * >( & val ) );
     253}
     254
    234255#include "PassVisitor.impl.h"

  • src/Common/PassVisitor.impl.h

    r816d61c rf13ee31  
    11#pragma once
    22
    3 #define VISIT_START( node )  \
    4         call_previsit( node ); \
    5         if( visit_children() ) { \
    6 
    7 #define VISIT_END( node )            \
    8         }                              \
    9         return call_postvisit( node ); \
    10 
    11 #define MUTATE_START( node )  \
    12         call_premutate( node ); \
    13         if( visit_children() ) { \
     3#define VISIT_START( node )                     \
     4        __attribute__((unused))                   \
     5        const auto & guard = init_guard();        \
     6        call_previsit( node );                    \
     7        if( visit_children() ) {                  \
     8                reset_visit();                      \
     9
     10#define VISIT_END( node )                       \
     11        }                                         \
     12        call_postvisit( node );                   \
     13
     14#define MUTATE_START( node )                    \
     15        __attribute__((unused))                   \
     16        const auto & guard = init_guard();        \
     17        call_premutate( node );                   \
     18        if( visit_children() ) {                  \
     19                reset_visit();                      \
    1420
    1521#define MUTATE_END( type, node )                \
    … …  
    1824
    1925
    20 #define VISIT_BODY( node )    \
    21         VISIT_START( node );  \
    22         Visitor::visit( node ); \
    23         VISIT_END( node ); \
     26#define VISIT_BODY( node )        \
     27        VISIT_START( node );        \
     28        Visitor::visit( node );     \
     29        VISIT_END( node );          \
    2430
    2531
    … …  
    389395
    390396//--------------------------------------------------------------------------
     397// ThrowStmt
     398
     399template< typename pass_type >
     400void PassVisitor< pass_type >::visit( ThrowStmt * node ) {
     401        VISIT_BODY( node );
     402}
     403
     404template< typename pass_type >
     405Statement * PassVisitor< pass_type >::mutate( ThrowStmt * node ) {
     406        MUTATE_BODY( Statement, node );
     407}
     408
     409//--------------------------------------------------------------------------
    391410// TryStmt
    392411template< typename pass_type >

  • src/Common/PassVisitor.proto.h

    r816d61c rf13ee31  
    11#pragma once
     2
     3typedef std::function<void( void * )> cleanup_func_t;
     4
     5class guard_value_impl {
     6public:
     7        guard_value_impl() = default;
     8
     9        ~guard_value_impl() {
     10                while( !cleanups.empty() ) {
     11                        auto& cleanup = cleanups.top();
     12                        cleanup.func( cleanup.val );
     13                        cleanups.pop();
     14                }
     15        }
     16
     17        void push( cleanup_func_t && func, void* val ) {
     18                cleanups.emplace( std::move(func), val );
     19        }
     20
     21private:
     22        struct cleanup_t {
     23                cleanup_func_t func;
     24                void * val;
     25
     26                cleanup_t( cleanup_func_t&& func, void * val ) : func(func), val(val) {}
     27        };
     28
     29        std::stack< cleanup_t > cleanups;
     30};
     31
     32typedef std::function< void( cleanup_func_t, void * ) > at_cleanup_t;
    233
    334//-------------------------------------------------------------------------------------------------------------------------------------------------------------------------
    … …  
    73104#define FIELD_PTR( type, name )                                                                                                        \
    74105template<typename pass_type>                                                                                                           \
    75 static inline auto name##_impl( pass_type& pass, __attribute__((unused)) int unused ) -> decltype( &pass.name ) { return &pass.name; }  \
     106static inline auto name##_impl( pass_type& pass, __attribute__((unused)) int unused ) -> decltype( &pass.name ) { return &pass.name; } \
    76107                                                                                                                                       \
    77108template<typename pass_type>                                                                                                           \
    … …  
    82113FIELD_PTR( std::list< Statement* >, stmtsToAddAfter  )
    83114FIELD_PTR( bool, skip_children )
     115FIELD_PTR( at_cleanup_t, at_cleanup )

  • src/InitTweak/GenInit.cc

    r816d61c rf13ee31  
    1616#include <stack>
    1717#include <list>
     18
     19#include "InitTweak.h"
    1820#include "GenInit.h"
    19 #include "InitTweak.h"
     21
     22#include "Common/PassVisitor.h"
     23
    2024#include "SynTree/Declaration.h"
    21 #include "SynTree/Type.h"
    2225#include "SynTree/Expression.h"
    23 #include "SynTree/Statement.h"
    2426#include "SynTree/Initializer.h"
    2527#include "SynTree/Mutator.h"
     28#include "SynTree/Statement.h"
     29#include "SynTree/Type.h"
     30
    2631#include "SymTab/Autogen.h"
    2732#include "SymTab/Mangler.h"
     33
     34#include "GenPoly/DeclMutator.h"
    2835#include "GenPoly/PolyMutator.h"
    29 #include "GenPoly/DeclMutator.h"
    3036#include "GenPoly/ScopedSet.h"
     37
    3138#include "ResolvExpr/typeops.h"
    3239
    … …  
    3744        }
    3845
    39         class ReturnFixer final : public GenPoly::PolyMutator {
     46        class ReturnFixer {
    4047          public:
    4148                /// consistently allocates a temporary variable for the return value
    … …  
    4451                static void makeReturnTemp( std::list< Declaration * > &translationUnit );
    4552
    46                 typedef GenPoly::PolyMutator Parent;
    47                 using Parent::mutate;
    48                 virtual DeclarationWithType * mutate( FunctionDecl *functionDecl ) override;
    49                 virtual Statement * mutate( ReturnStmt * returnStmt ) override;
     53                void premutate( FunctionDecl *functionDecl );
     54                void premutate( ReturnStmt * returnStmt );
     55
     56                at_cleanup_t at_cleanup;
     57                std::list< Statement * > stmtsToAddBefore;
    5058
    5159          protected:
    … …  
    129137
    130138        void ReturnFixer::makeReturnTemp( std::list< Declaration * > & translationUnit ) {
    131                 ReturnFixer fixer;
     139                PassVisitor<ReturnFixer> fixer;
    132140                mutateAll( translationUnit, fixer );
    133141        }
    134142
    135         Statement *ReturnFixer::mutate( ReturnStmt *returnStmt ) {
     143        void ReturnFixer::premutate( ReturnStmt *returnStmt ) {
    136144                std::list< DeclarationWithType * > & returnVals = ftype->get_returnVals();
    137145                assert( returnVals.size() == 0 || returnVals.size() == 1 );
    … …  
    144152                        construct->get_args().push_back( new AddressExpr( new VariableExpr( returnVals.front() ) ) );
    145153                        construct->get_args().push_back( returnStmt->get_expr() );
    146                         stmtsToAdd.push_back(new ExprStmt(noLabels, construct));
     154                        stmtsToAddBefore.push_back(new ExprStmt(noLabels, construct));
    147155
    148156                        // return the retVal object
    149157                        returnStmt->set_expr( new VariableExpr( returnVals.front() ) );
    150158                } // if
    151                 return returnStmt;
    152         }
    153 
    154         DeclarationWithType* ReturnFixer::mutate( FunctionDecl *functionDecl ) {
    155                 ValueGuard< FunctionType * > oldFtype( ftype );
    156                 ValueGuard< std::string > oldFuncName( funcName );
     159        }
     160
     161        void ReturnFixer::premutate( FunctionDecl *functionDecl ) {
     162                GuardValue( this, ftype );
     163                GuardValue( this, funcName );
    157164
    158165                ftype = functionDecl->get_functionType();
    159166                funcName = functionDecl->get_name();
    160                 return Parent::mutate( functionDecl );
    161167        }
    162168
Note: See TracChangeset for help on using the changeset viewer.