Futures and promises
In computer science, future, promise, delay, and deferred refer to constructs used for synchronizing program execution in some concurrent programming languages. They describe an object that acts as a proxy for a result that is initially unknown, usually because the computation of its value is yet incomplete.
The term promise was proposed in 1976 by Daniel P. Friedman and David Wise, and Peter Hibbard called it eventual. A somewhat similar concept future was introduced in 1977 in a paper by Henry Baker and Carl Hewitt.
The terms future, promise, delay, and deferred are often used interchangeably, although some differences in usage between future and promise are treated below. Specifically, when usage is distinguished, a future is a read-only placeholder view of a variable, while a promise is a writable, single assignment container which sets the value of the future. Notably, a future may be defined without specifying which specific promise will set its value, and different possible promises may set the value of a given future, though this can be done only once for a given future. In other cases a future and a promise are created together and associated with each other: the future is the value, the promise is the function that sets the value – essentially the return value (future) of an asynchronous function (promise). Setting the value of a future is also called resolving, fulfilling, or binding it.
- 1 Applications
- 2 Implicit vs. explicit
- 3 Promise pipelining
- 4 Read-only views
- 5 Thread-specific futures
- 6 Blocking vs non-blocking semantics
- 7 Related constructs
- 8 Relations between the expressiveness of different forms of future
- 9 Evaluation strategy
- 10 Semantics of futures in the actor model
- 11 History
- 12 List of implementations
- 13 References
- 14 External links
Futures and promises originated in functional programming and related paradigms (such as logic programming) to decouple a value (a future) from how it was computed (a promise), allowing the computation to be done more flexibly, notably by parallelizing it. Later, it found use in distributed computing, in reducing the latency from communication round trips. Later still, it gained more use by allowing writing asynchronous programs in direct style, rather than in continuation-passing style.
Implicit vs. explicit
Use of futures may be implicit (any use of the future automatically obtains its value, as if it were an ordinary reference) or explicit (the user must call a function to obtain the value, such as the
get method of
java.util.concurrent.Future in Java). Obtaining the value of an explicit future can be called stinging or forcing. Explicit futures can be implemented as a library, whereas implicit futures are usually implemented as part of the language.
The original Baker and Hewitt paper described implicit futures, which are naturally supported in the actor model of computation and pure object-oriented programming languages like Smalltalk. The Friedman and Wise paper described only explicit futures, probably reflecting the difficulty of efficiently implementing implicit futures on stock hardware. The difficulty is that stock hardware does not deal with futures for primitive data types like integers. For example, an add instruction does not know how to deal with
3 + future factorial(100000). In pure actor or object languages this problem can be solved by sending
future factorial(100000) the message
+, which asks the future to add
3 to itself and return the result. Note that the message passing approach works regardless of when
factorial(100000) finishes computation and that no stinging/forcing is needed.
The use of futures can dramatically reduce latency in distributed systems. For instance, futures enable promise pipelining, as implemented in the languages E and Joule, which was also called call-stream  in the language Argus.
Consider an expression involving conventional remote procedure calls, such as:
t3 := ( x.a() ).c( y.b() )
which could be expanded to
t1 := x.a(); t2 := y.b(); t3 := t1.c(t2);
Each statement needs a message to be sent and a reply received before the next statement can proceed. Suppose, for example, that
t2 are all located on the same remote machine. In this case, two complete network round-trips to that machine must take place before the third statement can begin to execute. The third statement will then cause yet another round-trip to the same remote machine.
Using futures, the above expression could be written
t3 := (x <- a()) <- c(y <- b())
which could be expanded to
t1 := x <- a(); t2 := y <- b(); t3 := t1 <- c(t2);
The syntax used here is that of the language E, where
x <- a() means to send the message
a() asynchronously to
x. All three variables are immediately assigned futures for their results, and execution proceeds to subsequent statements. Later attempts to resolve the value of
t3 may cause a delay; however, pipelining can reduce the number of round-trips needed. If, as in the prior example,
t2 are all located on the same remote machine, a pipelined implementation can compute
t3 with one round-trip instead of three. Because all three messages are destined for objects which are on the same remote machine, only one request need be sent and only one response need be received containing the result. Note also that the send
t1 <- c(t2) would not block even if
t2 were on different machines to each other, or to
Promise pipelining should be distinguished from parallel asynchronous message passing. In a system supporting parallel message passing but not pipelining, the message sends
x <- a() and
y <- b() in the above example could proceed in parallel, but the send of
t1 <- c(t2) would have to wait until both
t2 had been received, even when
t2 are on the same remote machine. The relative latency advantage of pipelining becomes even greater in more complicated situations involving many messages.
Promise pipelining also should not be confused with pipelined message processing in actor systems, where it is possible for an actor to specify and begin executing a behaviour for the next message before having completed processing of the current message.
- In Oz, the
!!operator is used to obtain a read-only view.
- In E and AmbientTalk, a future is represented by a pair of values called a promise/resolver pair. The promise represents the read-only view, and the resolver is needed to set the future's value.
- In C++11 a
std::futureprovides a read-only view. The value is set directly by using a
std::promise, or set to the result of a function call using
- In the Dojo Toolkit's Deferred API as of version 1.5, a consumer-only promise object represents a read-only view.
- In Alice ML, futures only provide a read-only view, whereas a promise contains both a future and the ability to resolve the future
- In .NET 4.0
System.Threading.Tasks.Task<T>represents a read-only view. Resolving the value can be done via
Support for read-only views is consistent with the principle of least privilege, since it enables the ability to set the value to be restricted to subjects that need to set it. In a system that also supports pipelining, the sender of an asynchronous message (with result) receives the read-only promise for the result, and the target of the message receives the resolver.
Some languages, such as Alice ML, define futures that are associated with a specific thread that computes the future's value. This computation can start either eagerly when the future is created, or lazily when its value is first needed. A lazy future is similar to a thunk, in the sense of a delayed computation.
Alice ML also supports futures that can be resolved by any thread, and calls these promises. This use of promise is different from its use in E as described above. In Alice, a promise is not a read-only view, and promise pipelining is unsupported. Instead, pipelining naturally happens for futures, including ones associated with promises.
Blocking vs non-blocking semantics
If the value of a future is accessed asynchronously, for example by sending a message to it, or by explicitly waiting for it using a construct such as
when in E, then there is no difficulty in delaying until the future is resolved before the message can be received or the wait completes. This is the only case to be considered in purely asynchronous systems such as pure actor languages.
However, in some systems it may also be possible to attempt to immediately or synchronously access a future's value. Then there is a design choice to be made:
- the access could block the current thread or process until the future is resolved (possibly with a timeout). This is the semantics of dataflow variables in the language Oz.
- the attempted synchronous access could always signal an error, for example throwing an exception. This is the semantics of remote promises in E.
- potentially, the access could succeed if the future is already resolved, but signal an error if it is not. This would have the disadvantage of introducing nondeterminism and the potential for race conditions, and seems to be an uncommon design choice.
As an example of the first possibility, in C++11, a thread that needs the value of a future can block until it is available by calling the
get() member functions. You can also specify a timeout on the wait using the
wait_until() member functions to avoid indefinite blocking. If the future arose from a call to
std::async then a blocking wait (without a timeout) may cause synchronous invocation of the function to compute the result on the waiting thread.
An I-var (as in the language Id) is a future with blocking semantics as defined above. An I-structure is a data structure containing I-vars. A related synchronization construct that can be set multiple times with different values is called an M-var. M-vars support atomic operations to take or put the current value, where taking the value also sets the M-var back to its initial empty state.
A concurrent logic variable is similar to a future, but is updated by unification, in the same way as logic variables in logic programming. Thus it can be bound more than once to unifiable values, but cannot be set back to an empty or unresolved state. The dataflow variables of Oz act as concurrent logic variables, and also have blocking semantics as mentioned above.
A concurrent constraint variable is a generalization of concurrent logic variables to support constraint logic programming: the constraint may be narrowed multiple times, indicating smaller sets of possible values. Typically there is a way to specify a thunk that should run whenever the constraint is narrowed further; this is needed to support constraint propagation.
Relations between the expressiveness of different forms of future
Eager thread-specific futures can be straightforwardly implemented in non-thread-specific futures, by creating a thread to calculate the value at the same time as creating the future. In this case it is desirable to return a read-only view to the client, so that only the newly created thread is able to resolve this future.
To implement implicit lazy thread-specific futures (as provided by Alice ML, for example) in terms in non-thread-specific futures, needs a mechanism to determine when the future's value is first needed (for example, the
WaitNeeded construct in Oz). If all values are objects, then the ability to implement transparent forwarding objects is sufficient, since the first message sent to the forwarder indicates that the future's value is needed.
Non-thread-specific futures can be implemented in thread-specific futures, assuming that the system supports message passing, by having the resolving thread send a message to the future's own thread. However, this can be viewed as unneeded complexity. In programming languages based on threads, the most expressive approach seems to be to provide a mix of non-thread-specific futures, read-only views, and either a WaitNeeded construct, or support for transparent forwarding.
The evaluation strategy of futures, which may be termed call by future, is non-deterministic: the value of a future will be evaluated at some time between when the future is created and when its value is used, but the precise time is not determined beforehand and can change from run to run. The computation can start as soon as the future is created (eager evaluation) or only when the value is actually needed (lazy evaluation), and may be suspended part-way through, or executed in one run. Once the value of a future is assigned, it is not recomputed on future accesses; this is like the memoization used in call by need.
A lazy future is a future that deterministically has lazy evaluation semantics: the computation of the future's value starts when the value is first needed, as in call by need. Lazy futures are of use in languages which evaluation strategy is by default not lazy. For example, in C++11 such lazy futures can be created by passing the
std::launch::deferred launch policy to
std::async, along with the function to compute the value.
Semantics of futures in the actor model
In the actor model, an expression of the form
future <Expression> is defined by how it responds to an
Eval message with environment E and customer C as follows: The future expression responds to the
Eval message by sending the customer C a newly created actor F (the proxy for the response of evaluating
<Expression>) as a return value concurrently with sending
Eval message with environment E and customer C. The default behavior of F is as follows:
- When F receives a request R, then it checks to see if it has already received a response (that can either be a return value or a thrown exception) from evaluating
<Expression>proceeding as follows:
- If it already has a response V, then
- If V is a return value, then it is sent the request R.
- If V is an exception, then it is thrown to the customer of the request R.
- If it does not already have a response, then R is stored in the queue of requests inside the F.
- If it already has a response V, then
- When F receives the response V from evaluating
<Expression>, then V is stored in F and
- If V is a return value, then all of the queued requests are sent to V.
- If V is an exception, then it is thrown to the customer of each of the queued requests.
However, some futures can deal with requests in special ways to provide greater parallelism. For example, the expression
1 + future factorial(n) can create a new future that will behave like the number
1+factorial(n). This trick does not always work. For example, the following conditional expression:
if m>future factorial(n) then print("bigger") else print("smaller")
suspends until the future for
factorial(n) has responded to the request asking if
m is greater than itself.
The future and/or promise constructs were first implemented in programming languages such as MultiLisp and Act 1. The use of logic variables for communication in concurrent logic programming languages was quite similar to futures. These began in Prolog with Freeze and IC Prolog, and became a true concurrency primitive with Relational Language, Concurrent Prolog, guarded Horn clauses (GHC), Parlog, Strand, Vulcan, Janus, Oz-Mozart, Flow Java, and Alice ML. The single-assignment I-var from dataflow programming languages, originating in Id and included in Reppy's Concurrent ML, is much like the concurrent logic variable.
The promise pipelining technique (using futures to overcome latency) was invented by Barbara Liskov and Liuba Shrira in 1988, and independently by Mark S. Miller, Dean Tribble and Rob Jellinghaus in the context of Project Xanadu circa 1989.
The term promise was coined by Liskov and Shrira, although they referred to the pipelining mechanism by the name call-stream, which is now rarely used.
Both the design described in Liskov and Shrira's paper, and the implementation of promise pipelining in Xanadu, had the limit that promise values were not first-class: an argument to, or the value returned by a call or send could not directly be a promise (so the example of promise pipelining given earlier, which uses a promise for the result of one send as an argument to another, would not have been directly expressible in the call-stream design or in the Xanadu implementation). It seems that promises and call-streams were never implemented in any public release of Argus, the programming language used in the Liskov and Shrira paper. Argus development stopped around 1988. The Xanadu implementation of promise pipelining only became publicly available with the release of the source code for Udanax Gold in 1999, and was never explained in any published document. The later implementations in Joule and E support fully first-class promises and resolvers.
Several early actor languages, including the Act series, supported both parallel message passing and pipelined message processing, but not promise pipelining. (Although it is technically possible to implement the last of these features in the first two, there is no evidence that the Act languages did so.)
After 2000, a major revival of interest in futures and promises occurred, due to their use in responsiveness of user interfaces, and in web development, due to the request–response model of message-passing. Several mainstream languages now have language support for futures and promises, most notably popularized by the
List of implementations
Languages supporting futures, promises, concurrent logic variables, dataflow variables, or I-vars, either by direct language support or in the standard library, include:
- Alice ML
- AmbientTalk (including first-class resolvers and read-only promises)
- C++, starting with C++11: std::future and std::promise
- Compositional C++
- Dart (with Future/Completer classes and the keywords await and async)
- Glasgow Haskell (I-vars and M-vars only)
- Id (I-vars and M-vars only)
- Java via
- Lucid (dataflow only)
- Some Lisps
- .NET via Tasks
- Oz version 3
- Python concurrent.futures, since 3.2, as proposed by the PEP 3148, and Python 3.5 added async and await
- R (promises for lazy evaluation, still single threaded)
- Scala via scala.concurrent package
- Squeak Smalltalk
- Swift (only via third party libraries)
- Visual Basic[clarification needed] 11 (via the keywords Async and Await)
Languages also supporting promise pipelining include:
Non-standard library based implementations of futures:
- For Common Lisp:
- For C++:
- For C# and other .NET languages: The Parallel Extensions library
- For Groovy: GPars
- Cujo.js' when.js  provides promises conforming to the Promises/A+ 1.1 specification
- The Dojo Toolkit supplies promises and Twisted style deferreds
- MochiKit inspired by Twisted's Deferreds
- jQuery's Deferred Object is based on the CommonJS Promises/A design.
- Q, by Kris Kowal, conforms to Promises/A+ 1.1
- RSVP.js, conforms to Promises/A+ 1.1
- YUI's promise class conforms to the Promises/A+ 1.0 specification.
- Bluebird, by Petka Antonov
- The Closure Library's promise package conforms to the Promises/A+ specification.
- See Promise/A+'s list for more implementations based on the Promise/A+ design.
- For Java:
- For Objective-C: MAFuture, RXPromise, ObjC-CollapsingFutures, PromiseKit, objc-promise, OAPromise,
- For OCaml: Lazy module implements lazy explicit futures
- For Perl: Future, Promises, and Reflex
- For PHP: React/Promise
- For Python:
- For R:
- future, implements an extendable future API with lazy and eager synchronous and multicore asynchronous futures
- For Ruby:
- For Rust:
- For Swift:
Futures can easily be implemented in channels: a future is a one-element channel, and a promise is a process that sends to the channel, fulfilling the future. This allows futures to be implemented in concurrent programming languages with support for channels, such as CSP and Go. The resulting futures are explicit, as they must be accessed by reading from the channel, rather than only evaluation.
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