(Chapter written by Jacques Garrigue)
This chapter gives an overview of the new features in OCaml 3: labels, and polymorphic variants.
If you have a look at modules ending in Labels in the standard library, you will see that function types have annotations you did not have in the functions you defined yourself.
#ListLabels.map;; - : f:(’a -> ’b) -> ’a list -> ’b list = <fun> #StringLabels.sub;; - : string -> pos:int -> len:int -> string = <fun>
Such annotations of the form name: are called labels. They are meant to document the code, allow more checking, and give more flexibility to function application. You can give such names to arguments in your programs, by prefixing them with a tilde ~.
#let f ~x ~y = x - y;; val f : x:int -> y:int -> int = <fun> #let x = 3 and y = 2 in f ~x ~y;; - : int = 1
When you want to use distinct names for the variable and the label appearing in the type, you can use a naming label of the form ~name:. This also applies when the argument is not a variable.
#let f ~x:x1 ~y:y1 = x1 - y1;; val f : x:int -> y:int -> int = <fun> #f ~x:3 ~y:2;; - : int = 1
Labels obey the same rules as other identifiers in Caml, that is you cannot use a reserved keyword (like in or to) as label.
Formal parameters and arguments are matched according to their respective labels1, the absence of label being interpreted as the empty label. This allows commuting arguments in applications. One can also partially apply a function on any argument, creating a new function of the remaining parameters.
#let f ~x ~y = x - y;; val f : x:int -> y:int -> int = <fun> #f ~y:2 ~x:3;; - : int = 1 #ListLabels.fold_left;; - : f:(’a -> ’b -> ’a) -> init:’a -> ’b list -> ’a = <fun> #ListLabels.fold_left [1;2;3] ~init:0 ~f:(+);; - : int = 6 #ListLabels.fold_left ~init:0;; - : f:(int -> ’a -> int) -> ’a list -> int = <fun>
If in a function several arguments bear the same label (or no label), they will not commute among themselves, and order matters. But they can still commute with other arguments.
#let hline ~x:x1 ~x:x2 ~y = (x1, x2, y);; val hline : x:’a -> x:’b -> y:’c -> ’a * ’b * ’c = <fun> #hline ~x:3 ~y:2 ~x:5;; - : int * int * int = (3, 5, 2)
As an exception to the above parameter matching rules, if an application is total, labels may be omitted. In practice, most applications are total, so that labels can be omitted in applications.
#f 3 2;; - : int = 1 #ListLabels.map succ [1;2;3];; - : int list = [2; 3; 4]
But beware that functions like ListLabels.fold_left whose result type is a type variable will never be considered as totally applied.
#ListLabels.fold_left (+) 0 [1;2;3];;
Error: This expression has type int -> int -> int
but an expression was expected of type ’a list
When a function is passed as an argument to an higher-order function, labels must match in both types. Neither adding nor removing labels are allowed.
#let h g = g ~x:3 ~y:2;;
val h : (x:int -> y:int -> ’a) -> ’a = <fun>
#h f;;
- : int = 1
#h (+);;
Error: This expression has type int -> int -> int
but an expression was expected of type x:int -> y:int -> ’a
Note that when you don’t need an argument, you can still use a wildcard pattern, but you must prefix it with the label.
#h (fun ~x:_ ~y -> y+1);; - : int = 3
An interesting feature of labeled arguments is that they can be made optional. For optional parameters, the question mark ? replaces the tilde ~ of non-optional ones, and the label is also prefixed by ? in the function type. Default values may be given for such optional parameters.
#let bump ?(step = 1) x = x + step;; val bump : ?step:int -> int -> int = <fun> #bump 2;; - : int = 3 #bump ~step:3 2;; - : int = 5
A function taking some optional arguments must also take at least one non-labeled argument. This is because the criterion for deciding whether an optional has been omitted is the application on a non-labeled argument appearing after this optional argument in the function type.
#let test ?(x = 0) ?(y = 0) () ?(z = 0) () = (x, y, z);; val test : ?x:int -> ?y:int -> unit -> ?z:int -> unit -> int * int * int = <fun> #test ();; - : ?z:int -> unit -> int * int * int = <fun> #test ~x:2 () ~z:3 ();; - : int * int * int = (2, 0, 3)
Optional parameters may also commute with non-optional or unlabelled ones, as long as they are applied simultaneously. By nature, optional arguments do not commute with unlabeled arguments applied independently.
#test ~y:2 ~x:3 () ();; - : int * int * int = (3, 2, 0) #test () () ~z:1 ~y:2 ~x:3;; - : int * int * int = (3, 2, 1) #(test () ()) ~z:1;; Error: This expression is not a function; it cannot be applied
Here (test () ()) is already (0,0,0) and cannot be further applied.
Optional arguments are actually implemented as option types. If you do not give a default value, you have access to their internal representation, type ’a option = None | Some of ’a. You can then provide different behaviors when an argument is present or not.
#let bump ?step x = match step with | None -> x * 2 | Some y -> x + y ;; val bump : ?step:int -> int -> int = <fun>
It may also be useful to relay an optional argument from a function call to another. This can be done by prefixing the applied argument with ?. This question mark disables the wrapping of optional argument in an option type.
#let test2 ?x ?y () = test ?x ?y () ();; val test2 : ?x:int -> ?y:int -> unit -> int * int * int = <fun> #test2 ?x:None;; - : ?y:int -> unit -> int * int * int = <fun>
While they provide an increased comfort for writing function applications, labels and optional arguments have the pitfall that they cannot be inferred as completely as the rest of the language.
You can see it in the following two examples.
#let h’ g = g ~y:2 ~x:3;;
val h’ : (y:int -> x:int -> ’a) -> ’a = <fun>
#h’ f;;
Error: This expression has type x:int -> y:int -> int
but an expression was expected of type y:int -> x:int -> ’a
#let bump_it bump x =
bump ~step:2 x;;
val bump_it : (step:int -> ’a -> ’b) -> ’a -> ’b = <fun>
#bump_it bump 1;;
Error: This expression has type ?step:int -> int -> int
but an expression was expected of type step:int -> ’a -> ’b
The first case is simple: g is passed ~y and then ~x, but f expects ~x and then ~y. This is correctly handled if we know the type of g to be x:int -> y:int -> int in advance, but otherwise this causes the above type clash. The simplest workaround is to apply formal parameters in a standard order.
The second example is more subtle: while we intended the argument bump to be of type ?step:int -> int -> int, it is inferred as step:int -> int -> ’a. These two types being incompatible (internally normal and optional arguments are different), a type error occurs when applying bump_it to the real bump.
We will not try here to explain in detail how type inference works. One must just understand that there is not enough information in the above program to deduce the correct type of g or bump. That is, there is no way to know whether an argument is optional or not, or which is the correct order, by looking only at how a function is applied. The strategy used by the compiler is to assume that there are no optional arguments, and that applications are done in the right order.
The right way to solve this problem for optional parameters is to add a type annotation to the argument bump.
#let bump_it (bump : ?step:int -> int -> int) x = bump ~step:2 x;; val bump_it : (?step:int -> int -> int) -> int -> int = <fun> #bump_it bump 1;; - : int = 3
In practive, such problems appear mostly when using objects whose methods have optional arguments, so that writing the type of object arguments is often a good idea.
Normally the compiler generates a type error if you attempt to pass to a function a parameter whose type is different from the expected one. However, in the specific case where the expected type is a non-labeled function type, and the argument is a function expecting optional parameters, the compiler will attempt to transform the argument to have it match the expected type, by passing None for all optional parameters.
#let twice f (x : int) = f(f x);; val twice : (int -> int) -> int -> int = <fun> #twice bump 2;; - : int = 8
This transformation is coherent with the intended semantics, including side-effects. That is, if the application of optional parameters shall produce side-effects, these are delayed until the received function is really applied to an argument.
Like for names, choosing labels for functions is not an easy task. A good labeling is a labeling which
We explain here the rules we applied when labeling OCaml libraries.
To speak in an “object-oriented” way, one can consider that each function has a main argument, its object, and other arguments related with its action, the parameters. To permit the combination of functions through functionals in commuting label mode, the object will not be labeled. Its role is clear by the function itself. The parameters are labeled with names reminding either of their nature or role. Best labels combine in their meaning nature and role. When this is not possible the role is to prefer, since the nature will often be given by the type itself. Obscure abbreviations should be avoided.
ListLabels.map : f:(’a -> ’b) -> ’a list -> ’b list UnixLabels.write : file_descr -> buf:string -> pos:int -> len:int -> unit
When there are several objects of same nature and role, they are all left unlabeled.
ListLabels.iter2 : f:(’a -> ’b -> ’c) -> ’a list -> ’b list -> unit
When there is no preferable object, all arguments are labeled.
StringLabels.blit : src:string -> src_pos:int -> dst:string -> dst_pos:int -> len:int -> unit
However, when there is only one argument, it is often left unlabeled.
StringLabels.create : int -> string
This principle also applies to functions of several arguments whose return type is a type variable, as long as the role of each argument is not ambiguous. Labeling such functions may lead to awkward error messages when one attempts to omit labels in an application, as we have seen with ListLabels.fold_left.
Here are some of the label names you will find throughout the libraries.
| Label | Meaning |
| f: | a function to be applied |
| pos: | a position in a string or array |
| len: | a length |
| buf: | a string used as buffer |
| src: | the source of an operation |
| dst: | the destination of an operation |
| init: | the initial value for an iterator |
| cmp: | a comparison function, e.g. Pervasives.compare |
| mode: | an operation mode or a flag list |
All these are only suggestions, but one shall keep in mind that the choice of labels is essential for readability. Bizarre choices will make the program harder to maintain.
In the ideal, the right function name with right labels shall be enough to understand the function’s meaning. Since one can get this information with OCamlBrowser or the ocaml toplevel, the documentation is only used when a more detailed specification is needed.
Variants as presented in section 1.4 are a powerful tool to build data structures and algorithms. However they sometimes lack flexibility when used in modular programming. This is due to the fact every constructor reserves a name to be used with a unique type. One cannot use the same name in another type, or consider a value of some type to belong to some other type with more constructors.
With polymorphic variants, this original assumption is removed. That is, a variant tag does not belong to any type in particular, the type system will just check that it is an admissible value according to its use. You need not define a type before using a variant tag. A variant type will be inferred independently for each of its uses.
In programs, polymorphic variants work like usual ones. You just have to prefix their names with a backquote character ‘.
#[‘On; ‘Off];; - : [> ‘Off | ‘On ] list = [‘On; ‘Off] #‘Number 1;; - : [> ‘Number of int ] = ‘Number 1 #let f = function ‘On -> 1 | ‘Off -> 0 | ‘Number n -> n;; val f : [< ‘Number of int | ‘Off | ‘On ] -> int = <fun> #List.map f [‘On; ‘Off];; - : int list = [1; 0]
[>‘Off|‘On] list means that to match this list, you should at least be able to match ‘Off and ‘On, without argument. [<‘On|‘Off|‘Number of int] means that f may be applied to ‘Off, ‘On (both without argument), or ‘Number n where n is an integer. The > and < inside the variant type shows that they may still be refined, either by defining more tags or allowing less. As such they contain an implicit type variable. Both variant types appearing only once in the type, the implicit type variables they constrain are not shown.
The above variant types were polymorphic, allowing further refinement. When writing type annotations, one will most often describe fixed variant types, that is types that can be no longer refined. This is also the case for type abbreviations. Such types do not contain < or >, but just an enumeration of the tags and their associated types, just like in a normal datatype definition.
#type ’a vlist = [‘Nil | ‘Cons of ’a * ’a vlist];; type ’a vlist = [ ‘Cons of ’a * ’a vlist | ‘Nil ] #let rec map f : ’a vlist -> ’b vlist = function | ‘Nil -> ‘Nil | ‘Cons(a, l) -> ‘Cons(f a, map f l) ;; val map : (’a -> ’b) -> ’a vlist -> ’b vlist = <fun>
Type-checking polymorphic variants is a subtle thing, and some expressions may result in more complex type information.
#let f = function ‘A -> ‘C | ‘B -> ‘D | x -> x;; val f : ([> ‘A | ‘B | ‘C | ‘D ] as ’a) -> ’a = <fun> #f ‘E;; - : [> ‘A | ‘B | ‘C | ‘D | ‘E ] = ‘E
Here we are seeing two phenomena. First, since this matching is open (the last case catches any tag), we obtain the type [> ‘A | ‘B] rather than [< ‘A | ‘B] in a closed matching. Then, since x is returned as is, input and return types are identical. The notation as ’a denotes such type sharing. If we apply f to yet another tag ‘E, it gets added to the list.
#let f1 = function ‘A x -> x = 1 | ‘B -> true | ‘C -> false let f2 = function ‘A x -> x = "a" | ‘B -> true ;; val f1 : [< ‘A of int | ‘B | ‘C ] -> bool = <fun> val f2 : [< ‘A of string | ‘B ] -> bool = <fun> #let f x = f1 x && f2 x;; val f : [< ‘A of string & int | ‘B ] -> bool = <fun>
Here f1 and f2 both accept the variant tags ‘A and ‘B, but the argument of ‘A is int for f1 and string for f2. In f’s type ‘C, only accepted by f1, disappears, but both argument types appear for ‘A as int & string. This means that if we pass the variant tag ‘A to f, its argument should be both int and string. Since there is no such value, f cannot be applied to ‘A, and ‘B is the only accepted input.
Even if a value has a fixed variant type, one can still give it a larger type through coercions. Coercions are normally written with both the source type and the destination type, but in simple cases the source type may be omitted.
#type ’a wlist = [‘Nil | ‘Cons of ’a * ’a wlist | ‘Snoc of ’a wlist * ’a];; type ’a wlist = [ ‘Cons of ’a * ’a wlist | ‘Nil | ‘Snoc of ’a wlist * ’a ] #let wlist_of_vlist l = (l : ’a vlist :> ’a wlist);; val wlist_of_vlist : ’a vlist -> ’a wlist = <fun> #let open_vlist l = (l : ’a vlist :> [> ’a vlist]);; val open_vlist : ’a vlist -> [> ’a vlist ] = <fun> #fun x -> (x :> [‘A|‘B|‘C]);; - : [< ‘A | ‘B | ‘C ] -> [ ‘A | ‘B | ‘C ] = <fun>
You may also selectively coerce values through pattern matching.
#let split_cases = function | ‘Nil | ‘Cons _ as x -> ‘A x | ‘Snoc _ as x -> ‘B x ;; val split_cases : [< ‘Cons of ’a | ‘Nil | ‘Snoc of ’b ] -> [> ‘A of [> ‘Cons of ’a | ‘Nil ] | ‘B of [> ‘Snoc of ’b ] ] = <fun>
When an or-pattern composed of variant tags is wrapped inside an alias-pattern, the alias is given a type containing only the tags enumerated in the or-pattern. This allows for many useful idioms, like incremental definition of functions.
#let num x = ‘Num x let eval1 eval (‘Num x) = x let rec eval x = eval1 eval x ;; val num : ’a -> [> ‘Num of ’a ] = <fun> val eval1 : ’a -> [< ‘Num of ’b ] -> ’b = <fun> val eval : [< ‘Num of ’a ] -> ’a = <fun> #let plus x y = ‘Plus(x,y) let eval2 eval = function | ‘Plus(x,y) -> eval x + eval y | ‘Num _ as x -> eval1 eval x let rec eval x = eval2 eval x ;; val plus : ’a -> ’b -> [> ‘Plus of ’a * ’b ] = <fun> val eval2 : (’a -> int) -> [< ‘Num of int | ‘Plus of ’a * ’a ] -> int = <fun> val eval : ([< ‘Num of int | ‘Plus of ’a * ’a ] as ’a) -> int = <fun>
To make this even more comfortable, you may use type definitions as abbreviations for or-patterns. That is, if you have defined type myvariant = [‘Tag1 int | ‘Tag2 bool], then the pattern #myvariant is equivalent to writing (‘Tag1(_ : int) | ‘Tag2(_ : bool)).
Such abbreviations may be used alone,
#let f = function | #myvariant -> "myvariant" | ‘Tag3 -> "Tag3";; val f : [< ‘Tag1 of int | ‘Tag2 of bool | ‘Tag3 ] -> string = <fun>
or combined with with aliases.
#let g1 = function ‘Tag1 _ -> "Tag1" | ‘Tag2 _ -> "Tag2";; val g1 : [< ‘Tag1 of ’a | ‘Tag2 of ’b ] -> string = <fun> #let g = function | #myvariant as x -> g1 x | ‘Tag3 -> "Tag3";; val g : [< ‘Tag1 of int | ‘Tag2 of bool | ‘Tag3 ] -> string = <fun>
After seeing the power of polymorphic variants, one may wonder why they were added to core language variants, rather than replacing them.
The answer is twofold. One first aspect is that while being pretty efficient, the lack of static type information allows for less optimizations, and makes polymorphic variants slightly heavier than core language ones. However noticeable differences would only appear on huge data structures.
More important is the fact that polymorphic variants, while being type-safe, result in a weaker type discipline. That is, core language variants do actually much more than ensuring type-safety, they also check that you use only declared constructors, that all constructors present in a data-structure are compatible, and they enforce typing constraints to their parameters.
For this reason, you must be more careful about making types explicit when you use polymorphic variants. When you write a library, this is easy since you can describe exact types in interfaces, but for simple programs you are probably better off with core language variants.
Beware also that some idioms make trivial errors very hard to find. For instance, the following code is probably wrong but the compiler has no way to see it.
#type abc = [‘A | ‘B | ‘C] ;; type abc = [ ‘A | ‘B | ‘C ] #let f = function | ‘As -> "A" | #abc -> "other" ;; val f : [< ‘A | ‘As | ‘B | ‘C ] -> string = <fun> #let f : abc -> string = f ;; val f : abc -> string = <fun>
You can avoid such risks by annotating the definition itself.
#let f : abc -> string = function | ‘As -> "A" | #abc -> "other" ;; Warning 11: this match case is unused. val f : abc -> string = <fun>