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author | Adam Chlipala <adam@chlipala.net> |
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date | Fri, 30 Nov 2012 11:57:55 -0500 |

parents | 40a9a36844d6 |

children | 5025a401ad9e |

rev | line source |
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adam@371 | 1 (* Copyright (c) 2008-2012, Adam Chlipala |

adamc@83 | 2 * |

adamc@83 | 3 * This work is licensed under a |

adamc@83 | 4 * Creative Commons Attribution-Noncommercial-No Derivative Works 3.0 |

adamc@83 | 5 * Unported License. |

adamc@83 | 6 * The license text is available at: |

adamc@83 | 7 * http://creativecommons.org/licenses/by-nc-nd/3.0/ |

adamc@83 | 8 *) |

adamc@83 | 9 |

adamc@83 | 10 (* begin hide *) |

adamc@85 | 11 Require Import Arith Bool List. |

adamc@83 | 12 |

adam@314 | 13 Require Import CpdtTactics MoreSpecif. |

adamc@83 | 14 |

adamc@83 | 15 Set Implicit Arguments. |

adamc@83 | 16 (* end hide *) |

adamc@83 | 17 |

adamc@83 | 18 |

adamc@83 | 19 (** %\chapter{More Dependent Types}% *) |

adamc@83 | 20 |

adam@425 | 21 (** Subset types and their relatives help us integrate verification with programming. Though they reorganize the certified programmer's workflow, they tend not to have deep effects on proofs. We write largely the same proofs as we would for classical verification, with some of the structure moved into the programs themselves. It turns out that, when we use dependent types to their full potential, we warp the development and proving process even more than that, picking up "free theorems" to the extent that often a certified program is hardly more complex than its uncertified counterpart in Haskell or ML. |

adamc@83 | 22 |

adam@476 | 23 In particular, we have only scratched the tip of the iceberg that is Coq's inductive definition mechanism. The inductive types we have seen so far have their counterparts in the other proof assistants that we surveyed in Chapter 1. This chapter explores the strange new world of dependent inductive datatypes outside [Prop], a possibility that sets Coq apart from all of the competition not based on type theory. *) |

adamc@83 | 24 |

adamc@84 | 25 |

adamc@84 | 26 (** * Length-Indexed Lists *) |

adamc@84 | 27 |

adam@338 | 28 (** Many introductions to dependent types start out by showing how to use them to eliminate array bounds checks%\index{array bounds checks}%. When the type of an array tells you how many elements it has, your compiler can detect out-of-bounds dereferences statically. Since we are working in a pure functional language, the next best thing is length-indexed lists%\index{length-indexed lists}%, which the following code defines. *) |

adamc@84 | 29 |

adamc@84 | 30 Section ilist. |

adamc@84 | 31 Variable A : Set. |

adamc@84 | 32 |

adamc@84 | 33 Inductive ilist : nat -> Set := |

adamc@84 | 34 | Nil : ilist O |

adamc@84 | 35 | Cons : forall n, A -> ilist n -> ilist (S n). |

adamc@84 | 36 |

adamc@84 | 37 (** We see that, within its section, [ilist] is given type [nat -> Set]. Previously, every inductive type we have seen has either had plain [Set] as its type or has been a predicate with some type ending in [Prop]. The full generality of inductive definitions lets us integrate the expressivity of predicates directly into our normal programming. |

adamc@84 | 38 |

adam@405 | 39 The [nat] argument to [ilist] tells us the length of the list. The types of [ilist]'s constructors tell us that a [Nil] list has length [O] and that a [Cons] list has length one greater than the length of its tail. We may apply [ilist] to any natural number, even natural numbers that are only known at runtime. It is this breaking of the%\index{phase distinction}% _phase distinction_ that characterizes [ilist] as _dependently typed_. |

adamc@84 | 40 |

adamc@213 | 41 In expositions of list types, we usually see the length function defined first, but here that would not be a very productive function to code. Instead, let us implement list concatenation. *) |

adamc@84 | 42 |

adamc@213 | 43 Fixpoint app n1 (ls1 : ilist n1) n2 (ls2 : ilist n2) : ilist (n1 + n2) := |

adamc@213 | 44 match ls1 with |

adamc@213 | 45 | Nil => ls2 |

adamc@213 | 46 | Cons _ x ls1' => Cons x (app ls1' ls2) |

adamc@213 | 47 end. |

adamc@84 | 48 |

adam@338 | 49 (** Past Coq versions signalled an error for this definition. The code is still invalid within Coq's core language, but current Coq versions automatically add annotations to the original program, producing a valid core program. These are the annotations on [match] discriminees that we began to study in the previous chapter. We can rewrite [app] to give the annotations explicitly. *) |

adamc@100 | 50 |

adamc@100 | 51 (* begin thide *) |

adam@338 | 52 Fixpoint app' n1 (ls1 : ilist n1) n2 (ls2 : ilist n2) : ilist (n1 + n2) := |

adam@338 | 53 match ls1 in (ilist n1) return (ilist (n1 + n2)) with |

adam@338 | 54 | Nil => ls2 |

adam@338 | 55 | Cons _ x ls1' => Cons x (app' ls1' ls2) |

adam@338 | 56 end. |

adamc@100 | 57 (* end thide *) |

adamc@84 | 58 |

adam@398 | 59 (** Using [return] alone allowed us to express a dependency of the [match] result type on the _value_ of the discriminee. What %\index{Gallina terms!in}%[in] adds to our arsenal is a way of expressing a dependency on the _type_ of the discriminee. Specifically, the [n1] in the [in] clause above is a _binding occurrence_ whose scope is the [return] clause. |

adamc@84 | 60 |

adam@398 | 61 We may use [in] clauses only to bind names for the arguments of an inductive type family. That is, each [in] clause must be an inductive type family name applied to a sequence of underscores and variable names of the proper length. The positions for _parameters_ to the type family must all be underscores. Parameters are those arguments declared with section variables or with entries to the left of the first colon in an inductive definition. They cannot vary depending on which constructor was used to build the discriminee, so Coq prohibits pointless matches on them. It is those arguments defined in the type to the right of the colon that we may name with [in] clauses. |

adamc@84 | 62 |

adam@479 | 63 Our [app] function could be typed in so-called%\index{stratified type systems}% _stratified_ type systems, which avoid true dependency. That is, we could consider the length indices to lists to live in a separate, compile-time-only universe from the lists themselves. Compile-time data may be _erased_ such that we can still execute a program. As an example where erasure would not work, consider an injection function from regular lists to length-indexed lists. Here the run-time computation actually depends on details of the compile-time argument, if we decide that the list to inject can be considered compile-time. More commonly, we think of lists as run-time data. Neither case will work with %\%naive erasure. (It is not too important to grasp the details of this run-time/compile-time distinction, since Coq's expressive power comes from avoiding such restrictions.) *) |

adamc@84 | 64 |

adamc@100 | 65 (* EX: Implement injection from normal lists *) |

adamc@100 | 66 |

adamc@100 | 67 (* begin thide *) |

adam@454 | 68 Fixpoint inject (ls : list A) : ilist (length ls) := |

adam@454 | 69 match ls with |

adam@454 | 70 | nil => Nil |

adam@454 | 71 | h :: t => Cons h (inject t) |

adam@454 | 72 end. |

adamc@84 | 73 |

adamc@84 | 74 (** We can define an inverse conversion and prove that it really is an inverse. *) |

adamc@84 | 75 |

adam@454 | 76 Fixpoint unject n (ls : ilist n) : list A := |

adam@454 | 77 match ls with |

adam@454 | 78 | Nil => nil |

adam@454 | 79 | Cons _ h t => h :: unject t |

adam@454 | 80 end. |

adamc@84 | 81 |

adam@454 | 82 Theorem inject_inverse : forall ls, unject (inject ls) = ls. |

adam@454 | 83 induction ls; crush. |

adam@454 | 84 Qed. |

adamc@100 | 85 (* end thide *) |

adamc@100 | 86 |

adam@338 | 87 (* EX: Implement statically checked "car"/"hd" *) |

adamc@84 | 88 |

adam@425 | 89 (** Now let us attempt a function that is surprisingly tricky to write. In ML, the list head function raises an exception when passed an empty list. With length-indexed lists, we can rule out such invalid calls statically, and here is a first attempt at doing so. We write [???] as a placeholder for a term that we do not know how to write, not for any real Coq notation like those introduced two chapters ago. |

adamc@84 | 90 [[ |

adam@454 | 91 Definition hd n (ls : ilist (S n)) : A := |

adam@454 | 92 match ls with |

adam@454 | 93 | Nil => ??? |

adam@454 | 94 | Cons _ h _ => h |

adam@454 | 95 end. |

adamc@213 | 96 ]] |

adamc@84 | 97 It is not clear what to write for the [Nil] case, so we are stuck before we even turn our function over to the type checker. We could try omitting the [Nil] case: |

adamc@84 | 98 [[ |

adam@454 | 99 Definition hd n (ls : ilist (S n)) : A := |

adam@454 | 100 match ls with |

adam@454 | 101 | Cons _ h _ => h |

adam@454 | 102 end. |

adam@338 | 103 ]] |

adamc@84 | 104 |

adam@338 | 105 << |

adamc@84 | 106 Error: Non exhaustive pattern-matching: no clause found for pattern Nil |

adam@338 | 107 >> |

adamc@84 | 108 |

adam@480 | 109 Unlike in ML, we cannot use inexhaustive pattern matching, because there is no conception of a <<Match>> exception to be thrown. In fact, recent versions of Coq _do_ allow this, by implicit translation to a [match] that considers all constructors; the error message above was generated by an older Coq version. It is educational to discover for ourselves the encoding that the most recent Coq versions use. We might try using an [in] clause somehow. |

adamc@84 | 110 |

adamc@84 | 111 [[ |

adam@454 | 112 Definition hd n (ls : ilist (S n)) : A := |

adam@454 | 113 match ls in (ilist (S n)) with |

adam@454 | 114 | Cons _ h _ => h |

adam@454 | 115 end. |

adamc@84 | 116 ]] |

adamc@84 | 117 |

adam@338 | 118 << |

adam@338 | 119 Error: The reference n was not found in the current environment |

adam@338 | 120 >> |

adam@338 | 121 |

adam@398 | 122 In this and other cases, we feel like we want [in] clauses with type family arguments that are not variables. Unfortunately, Coq only supports variables in those positions. A completely general mechanism could only be supported with a solution to the problem of higher-order unification%~\cite{HOU}%, which is undecidable. There _are_ useful heuristics for handling non-variable indices which are gradually making their way into Coq, but we will spend some time in this and the next few chapters on effective pattern matching on dependent types using only the primitive [match] annotations. |

adamc@84 | 123 |

adamc@84 | 124 Our final, working attempt at [hd] uses an auxiliary function and a surprising [return] annotation. *) |

adamc@84 | 125 |

adamc@100 | 126 (* begin thide *) |

adam@454 | 127 Definition hd' n (ls : ilist n) := |

adam@454 | 128 match ls in (ilist n) return (match n with O => unit | S _ => A end) with |

adam@454 | 129 | Nil => tt |

adam@454 | 130 | Cons _ h _ => h |

adam@454 | 131 end. |

adamc@84 | 132 |

adam@454 | 133 Check hd'. |

adam@283 | 134 (** %\vspace{-.15in}% [[ |

adam@283 | 135 hd' |

adam@283 | 136 : forall n : nat, ilist n -> match n with |

adam@283 | 137 | 0 => unit |

adam@283 | 138 | S _ => A |

adam@283 | 139 end |

adam@302 | 140 ]] |

adam@302 | 141 *) |

adam@283 | 142 |

adam@454 | 143 Definition hd n (ls : ilist (S n)) : A := hd' ls. |

adamc@100 | 144 (* end thide *) |

adamc@84 | 145 |

adam@338 | 146 End ilist. |

adam@338 | 147 |

adamc@84 | 148 (** We annotate our main [match] with a type that is itself a [match]. We write that the function [hd'] returns [unit] when the list is empty and returns the carried type [A] in all other cases. In the definition of [hd], we just call [hd']. Because the index of [ls] is known to be nonzero, the type checker reduces the [match] in the type of [hd'] to [A]. *) |

adamc@84 | 149 |

adamc@85 | 150 |

adam@371 | 151 (** * The One Rule of Dependent Pattern Matching in Coq *) |

adam@371 | 152 |

adam@405 | 153 (** The rest of this chapter will demonstrate a few other elegant applications of dependent types in Coq. Readers encountering such ideas for the first time often feel overwhelmed, concluding that there is some magic at work whereby Coq sometimes solves the halting problem for the programmer and sometimes does not, applying automated program understanding in a way far beyond what is found in conventional languages. The point of this section is to cut off that sort of thinking right now! Dependent type-checking in Coq follows just a few algorithmic rules. Chapters 10 and 12 introduce many of those rules more formally, and the main additional rule is centered on%\index{dependent pattern matching}% _dependent pattern matching_ of the kind we met in the previous section. |

adam@371 | 154 |

adam@405 | 155 A dependent pattern match is a [match] expression where the type of the overall [match] is a function of the value and/or the type of the%\index{discriminee}% _discriminee_, the value being matched on. In other words, the [match] type _depends_ on the discriminee. |

adam@371 | 156 |

adam@398 | 157 When exactly will Coq accept a dependent pattern match as well-typed? Some other dependently typed languages employ fancy decision procedures to determine when programs satisfy their very expressive types. The situation in Coq is just the opposite. Only very straightforward symbolic rules are applied. Such a design choice has its drawbacks, as it forces programmers to do more work to convince the type checker of program validity. However, the great advantage of a simple type checking algorithm is that its action on _invalid_ programs is easier to understand! |

adam@371 | 158 |

adam@371 | 159 We come now to the one rule of dependent pattern matching in Coq. A general dependent pattern match assumes this form (with unnecessary parentheses included to make the syntax easier to parse): |

adam@371 | 160 [[ |

adam@480 | 161 match E as y in (T x1 ... xn) return U with |

adam@371 | 162 | C z1 ... zm => B |

adam@371 | 163 | ... |

adam@371 | 164 end |

adam@371 | 165 ]] |

adam@371 | 166 |

adam@480 | 167 The discriminee is a term [E], a value in some inductive type family [T], which takes [n] arguments. An %\index{as clause}%[as] clause binds the name [y] to refer to the discriminee [E]. An %\index{in clause}%[in] clause binds an explicit name [xi] for the [i]th argument passed to [T] in the type of [E]. |

adam@371 | 168 |

adam@480 | 169 We bind these new variables [y] and [xi] so that they may be referred to in [U], a type given in the %\index{return clause}%[return] clause. The overall type of the [match] will be [U], with [E] substituted for [y], and with each [xi] substituted by the actual argument appearing in that position within [E]'s type. |

adam@371 | 170 |

adam@371 | 171 In general, each case of a [match] may have a pattern built up in several layers from the constructors of various inductive type families. To keep this exposition simple, we will focus on patterns that are just single applications of inductive type constructors to lists of variables. Coq actually compiles the more general kind of pattern matching into this more restricted kind automatically, so understanding the typing of [match] requires understanding the typing of [match]es lowered to match one constructor at a time. |

adam@371 | 172 |

adam@371 | 173 The last piece of the typing rule tells how to type-check a [match] case. A generic constructor application [C z1 ... zm] has some type [T x1' ... xn'], an application of the type family used in [E]'s type, probably with occurrences of the [zi] variables. From here, a simple recipe determines what type we will require for the case body [B]. The type of [B] should be [U] with the following two substitutions applied: we replace [y] (the [as] clause variable) with [C z1 ... zm], and we replace each [xi] (the [in] clause variables) with [xi']. In other words, we specialize the result type based on what we learn based on which pattern has matched the discriminee. |

adam@371 | 174 |

adam@371 | 175 This is an exhaustive description of the ways to specify how to take advantage of which pattern has matched! No other mechanisms come into play. For instance, there is no way to specify that the types of certain free variables should be refined based on which pattern has matched. In the rest of the book, we will learn design patterns for achieving similar effects, where each technique leads to an encoding only in terms of [in], [as], and [return] clauses. |

adam@371 | 176 |

adam@425 | 177 A few details have been omitted above. In Chapter 3, we learned that inductive type families may have both%\index{parameters}% _parameters_ and regular arguments. Within an [in] clause, a parameter position must have the wildcard [_] written, instead of a variable. (In general, Coq uses wildcard [_]'s either to indicate pattern variables that will not be mentioned again or to indicate positions where we would like type inference to infer the appropriate terms.) Furthermore, recent Coq versions are adding more and more heuristics to infer dependent [match] annotations in certain conditions. The general annotation inference problem is undecidable, so there will always be serious limitations on how much work these heuristics can do. When in doubt about why a particular dependent [match] is failing to type-check, add an explicit [return] annotation! At that point, the mechanical rule sketched in this section will provide a complete account of "what the type checker is thinking." Be sure to avoid the common pitfall of writing a [return] annotation that does not mention any variables bound by [in] or [as]; such a [match] will never refine typing requirements based on which pattern has matched. (One simple exception to this rule is that, when the discriminee is a variable, that same variable may be treated as if it were repeated as an [as] clause.) *) |

adam@371 | 178 |

adam@371 | 179 |

adamc@85 | 180 (** * A Tagless Interpreter *) |

adamc@85 | 181 |

adam@405 | 182 (** A favorite example for motivating the power of functional programming is implementation of a simple expression language interpreter. In ML and Haskell, such interpreters are often implemented using an algebraic datatype of values, where at many points it is checked that a value was built with the right constructor of the value type. With dependent types, we can implement a%\index{tagless interpreters}% _tagless_ interpreter that both removes this source of runtime inefficiency and gives us more confidence that our implementation is correct. *) |

adamc@85 | 183 |

adamc@85 | 184 Inductive type : Set := |

adamc@85 | 185 | Nat : type |

adamc@85 | 186 | Bool : type |

adamc@85 | 187 | Prod : type -> type -> type. |

adamc@85 | 188 |

adamc@85 | 189 Inductive exp : type -> Set := |

adamc@85 | 190 | NConst : nat -> exp Nat |

adamc@85 | 191 | Plus : exp Nat -> exp Nat -> exp Nat |

adamc@85 | 192 | Eq : exp Nat -> exp Nat -> exp Bool |

adamc@85 | 193 |

adamc@85 | 194 | BConst : bool -> exp Bool |

adamc@85 | 195 | And : exp Bool -> exp Bool -> exp Bool |

adamc@85 | 196 | If : forall t, exp Bool -> exp t -> exp t -> exp t |

adamc@85 | 197 |

adamc@85 | 198 | Pair : forall t1 t2, exp t1 -> exp t2 -> exp (Prod t1 t2) |

adamc@85 | 199 | Fst : forall t1 t2, exp (Prod t1 t2) -> exp t1 |

adamc@85 | 200 | Snd : forall t1 t2, exp (Prod t1 t2) -> exp t2. |

adamc@85 | 201 |

adam@448 | 202 (** We have a standard algebraic datatype [type], defining a type language of naturals, Booleans, and product (pair) types. Then we have the indexed inductive type [exp], where the argument to [exp] tells us the encoded type of an expression. In effect, we are defining the typing rules for expressions simultaneously with the syntax. |

adamc@85 | 203 |

adam@398 | 204 We can give types and expressions semantics in a new style, based critically on the chance for _type-level computation_. *) |

adamc@85 | 205 |

adamc@85 | 206 Fixpoint typeDenote (t : type) : Set := |

adamc@85 | 207 match t with |

adamc@85 | 208 | Nat => nat |

adamc@85 | 209 | Bool => bool |

adamc@85 | 210 | Prod t1 t2 => typeDenote t1 * typeDenote t2 |

adamc@85 | 211 end%type. |

adamc@85 | 212 |

adam@465 | 213 (** The [typeDenote] function compiles types of our object language into "native" Coq types. It is deceptively easy to implement. The only new thing we see is the [%]%\coqdocvar{%#<tt>#type#</tt>#%}% annotation, which tells Coq to parse the [match] expression using the notations associated with types. Without this annotation, the [*] would be interpreted as multiplication on naturals, rather than as the product type constructor. The token %\coqdocvar{%#<tt>#type#</tt>#%}% is one example of an identifier bound to a%\index{notation scope delimiter}% _notation scope delimiter_. In this book, we will not go into more detail on notation scopes, but the Coq manual can be consulted for more information. |

adamc@85 | 214 |

adamc@85 | 215 We can define a function [expDenote] that is typed in terms of [typeDenote]. *) |

adamc@85 | 216 |

adamc@213 | 217 Fixpoint expDenote t (e : exp t) : typeDenote t := |

adamc@213 | 218 match e with |

adamc@85 | 219 | NConst n => n |

adamc@85 | 220 | Plus e1 e2 => expDenote e1 + expDenote e2 |

adamc@85 | 221 | Eq e1 e2 => if eq_nat_dec (expDenote e1) (expDenote e2) then true else false |

adamc@85 | 222 |

adamc@85 | 223 | BConst b => b |

adamc@85 | 224 | And e1 e2 => expDenote e1 && expDenote e2 |

adamc@85 | 225 | If _ e' e1 e2 => if expDenote e' then expDenote e1 else expDenote e2 |

adamc@85 | 226 |

adamc@85 | 227 | Pair _ _ e1 e2 => (expDenote e1, expDenote e2) |

adamc@85 | 228 | Fst _ _ e' => fst (expDenote e') |

adamc@85 | 229 | Snd _ _ e' => snd (expDenote e') |

adamc@85 | 230 end. |

adamc@85 | 231 |

adam@437 | 232 (* begin hide *) |

adam@437 | 233 (* begin thide *) |

adam@437 | 234 Definition sumboool := sumbool. |

adam@437 | 235 (* end thide *) |

adam@437 | 236 (* end hide *) |

adam@437 | 237 |

adam@448 | 238 (** Despite the fancy type, the function definition is routine. In fact, it is less complicated than what we would write in ML or Haskell 98, since we do not need to worry about pushing final values in and out of an algebraic datatype. The only unusual thing is the use of an expression of the form [if E then true else false] in the [Eq] case. Remember that [eq_nat_dec] has a rich dependent type, rather than a simple Boolean type. Coq's native [if] is overloaded to work on a test of any two-constructor type, so we can use [if] to build a simple Boolean from the [sumbool] that [eq_nat_dec] returns. |

adamc@85 | 239 |

adamc@85 | 240 We can implement our old favorite, a constant folding function, and prove it correct. It will be useful to write a function [pairOut] that checks if an [exp] of [Prod] type is a pair, returning its two components if so. Unsurprisingly, a first attempt leads to a type error. |

adamc@85 | 241 [[ |

adamc@85 | 242 Definition pairOut t1 t2 (e : exp (Prod t1 t2)) : option (exp t1 * exp t2) := |

adamc@85 | 243 match e in (exp (Prod t1 t2)) return option (exp t1 * exp t2) with |

adamc@85 | 244 | Pair _ _ e1 e2 => Some (e1, e2) |

adamc@85 | 245 | _ => None |

adamc@85 | 246 end. |

adam@338 | 247 ]] |

adamc@85 | 248 |

adam@338 | 249 << |

adamc@85 | 250 Error: The reference t2 was not found in the current environment |

adam@338 | 251 >> |

adamc@85 | 252 |

adamc@85 | 253 We run again into the problem of not being able to specify non-variable arguments in [in] clauses. The problem would just be hopeless without a use of an [in] clause, though, since the result type of the [match] depends on an argument to [exp]. Our solution will be to use a more general type, as we did for [hd]. First, we define a type-valued function to use in assigning a type to [pairOut]. *) |

adamc@85 | 254 |

adamc@100 | 255 (* EX: Define a function [pairOut : forall t1 t2, exp (Prod t1 t2) -> option (exp t1 * exp t2)] *) |

adamc@100 | 256 |

adamc@100 | 257 (* begin thide *) |

adamc@85 | 258 Definition pairOutType (t : type) := |

adamc@85 | 259 match t with |

adamc@85 | 260 | Prod t1 t2 => option (exp t1 * exp t2) |

adamc@85 | 261 | _ => unit |

adamc@85 | 262 end. |

adamc@85 | 263 |

adamc@85 | 264 (** When passed a type that is a product, [pairOutType] returns our final desired type. On any other input type, [pairOutType] returns [unit], since we do not care about extracting components of non-pairs. Now we can write another helper function to provide the default behavior of [pairOut], which we will apply for inputs that are not literal pairs. *) |

adamc@85 | 265 |

adamc@85 | 266 Definition pairOutDefault (t : type) := |

adamc@85 | 267 match t return (pairOutType t) with |

adamc@85 | 268 | Prod _ _ => None |

adamc@85 | 269 | _ => tt |

adamc@85 | 270 end. |

adamc@85 | 271 |

adamc@85 | 272 (** Now [pairOut] is deceptively easy to write. *) |

adamc@85 | 273 |

adamc@85 | 274 Definition pairOut t (e : exp t) := |

adamc@85 | 275 match e in (exp t) return (pairOutType t) with |

adamc@85 | 276 | Pair _ _ e1 e2 => Some (e1, e2) |

adamc@85 | 277 | _ => pairOutDefault _ |

adamc@85 | 278 end. |

adamc@100 | 279 (* end thide *) |

adamc@85 | 280 |

adam@338 | 281 (** There is one important subtlety in this definition. Coq allows us to use convenient ML-style pattern matching notation, but, internally and in proofs, we see that patterns are expanded out completely, matching one level of inductive structure at a time. Thus, the default case in the [match] above expands out to one case for each constructor of [exp] besides [Pair], and the underscore in [pairOutDefault _] is resolved differently in each case. From an ML or Haskell programmer's perspective, what we have here is type inference determining which code is run (returning either [None] or [tt]), which goes beyond what is possible with type inference guiding parametric polymorphism in Hindley-Milner languages%\index{Hindley-Milner}%, but is similar to what goes on with Haskell type classes%\index{type classes}%. |

adamc@85 | 282 |

adam@454 | 283 With [pairOut] available, we can write [cfold] in a straightforward way. There are really no surprises beyond that Coq verifies that this code has such an expressive type, given the small annotation burden. In some places, we see that Coq's [match] annotation inference is too smart for its own good, and we have to turn that inference off with explicit [return] clauses. *) |

adamc@85 | 284 |

adamc@204 | 285 Fixpoint cfold t (e : exp t) : exp t := |

adamc@204 | 286 match e with |

adamc@85 | 287 | NConst n => NConst n |

adamc@85 | 288 | Plus e1 e2 => |

adamc@85 | 289 let e1' := cfold e1 in |

adamc@85 | 290 let e2' := cfold e2 in |

adam@417 | 291 match e1', e2' return exp Nat with |

adamc@85 | 292 | NConst n1, NConst n2 => NConst (n1 + n2) |

adamc@85 | 293 | _, _ => Plus e1' e2' |

adamc@85 | 294 end |

adamc@85 | 295 | Eq e1 e2 => |

adamc@85 | 296 let e1' := cfold e1 in |

adamc@85 | 297 let e2' := cfold e2 in |

adam@417 | 298 match e1', e2' return exp Bool with |

adamc@85 | 299 | NConst n1, NConst n2 => BConst (if eq_nat_dec n1 n2 then true else false) |

adamc@85 | 300 | _, _ => Eq e1' e2' |

adamc@85 | 301 end |

adamc@85 | 302 |

adamc@85 | 303 | BConst b => BConst b |

adamc@85 | 304 | And e1 e2 => |

adamc@85 | 305 let e1' := cfold e1 in |

adamc@85 | 306 let e2' := cfold e2 in |

adam@417 | 307 match e1', e2' return exp Bool with |

adamc@85 | 308 | BConst b1, BConst b2 => BConst (b1 && b2) |

adamc@85 | 309 | _, _ => And e1' e2' |

adamc@85 | 310 end |

adamc@85 | 311 | If _ e e1 e2 => |

adamc@85 | 312 let e' := cfold e in |

adamc@85 | 313 match e' with |

adamc@85 | 314 | BConst true => cfold e1 |

adamc@85 | 315 | BConst false => cfold e2 |

adamc@85 | 316 | _ => If e' (cfold e1) (cfold e2) |

adamc@85 | 317 end |

adamc@85 | 318 |

adamc@85 | 319 | Pair _ _ e1 e2 => Pair (cfold e1) (cfold e2) |

adamc@85 | 320 | Fst _ _ e => |

adamc@85 | 321 let e' := cfold e in |

adamc@85 | 322 match pairOut e' with |

adamc@85 | 323 | Some p => fst p |

adamc@85 | 324 | None => Fst e' |

adamc@85 | 325 end |

adamc@85 | 326 | Snd _ _ e => |

adamc@85 | 327 let e' := cfold e in |

adamc@85 | 328 match pairOut e' with |

adamc@85 | 329 | Some p => snd p |

adamc@85 | 330 | None => Snd e' |

adamc@85 | 331 end |

adamc@85 | 332 end. |

adamc@85 | 333 |

adamc@85 | 334 (** The correctness theorem for [cfold] turns out to be easy to prove, once we get over one serious hurdle. *) |

adamc@85 | 335 |

adamc@85 | 336 Theorem cfold_correct : forall t (e : exp t), expDenote e = expDenote (cfold e). |

adamc@100 | 337 (* begin thide *) |

adamc@85 | 338 induction e; crush. |

adamc@85 | 339 |

adamc@85 | 340 (** The first remaining subgoal is: |

adamc@85 | 341 |

adamc@85 | 342 [[ |

adamc@85 | 343 expDenote (cfold e1) + expDenote (cfold e2) = |

adamc@85 | 344 expDenote |

adamc@85 | 345 match cfold e1 with |

adamc@85 | 346 | NConst n1 => |

adamc@85 | 347 match cfold e2 with |

adamc@85 | 348 | NConst n2 => NConst (n1 + n2) |

adamc@85 | 349 | Plus _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 350 | Eq _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 351 | BConst _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 352 | And _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 353 | If _ _ _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 354 | Pair _ _ _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 355 | Fst _ _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 356 | Snd _ _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 357 end |

adamc@85 | 358 | Plus _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 359 | Eq _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 360 | BConst _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 361 | And _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 362 | If _ _ _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 363 | Pair _ _ _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 364 | Fst _ _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 365 | Snd _ _ _ => Plus (cfold e1) (cfold e2) |

adamc@85 | 366 end |

adamc@213 | 367 |

adamc@85 | 368 ]] |

adamc@85 | 369 |

adam@454 | 370 We would like to do a case analysis on [cfold e1], and we attempt to do so in the way that has worked so far. |

adamc@85 | 371 [[ |

adamc@85 | 372 destruct (cfold e1). |

adam@338 | 373 ]] |

adamc@85 | 374 |

adam@338 | 375 << |

adamc@85 | 376 User error: e1 is used in hypothesis e |

adam@338 | 377 >> |

adamc@85 | 378 |

adamc@85 | 379 Coq gives us another cryptic error message. Like so many others, this one basically means that Coq is not able to build some proof about dependent types. It is hard to generate helpful and specific error messages for problems like this, since that would require some kind of understanding of the dependency structure of a piece of code. We will encounter many examples of case-specific tricks for recovering from errors like this one. |

adamc@85 | 380 |

adam@480 | 381 For our current proof, we can use a tactic [dep_destruct]%\index{tactics!dep\_destruct}% defined in the book's [CpdtTactics] module. General elimination/inversion of dependently typed hypotheses is undecidable, as witnessed by a simple reduction to the known-undecidable problem of higher-order unification, which has come up a few times already. The tactic [dep_destruct] makes a best effort to handle some common cases, relying upon the more primitive %\index{tactics!dependent destruction}%[dependent destruction] tactic that comes with Coq. In a future chapter, we will learn about the explicit manipulation of equality proofs that is behind [dependent destruction]'s implementation, but for now, we treat it as a useful black box. (In Chapter 12, we will also see how [dependent destruction] forces us to make a larger philosophical commitment about our logic than we might like, and we will see some workarounds.) *) |

adamc@85 | 382 |

adamc@85 | 383 dep_destruct (cfold e1). |

adamc@85 | 384 |

adamc@85 | 385 (** This successfully breaks the subgoal into 5 new subgoals, one for each constructor of [exp] that could produce an [exp Nat]. Note that [dep_destruct] is successful in ruling out the other cases automatically, in effect automating some of the work that we have done manually in implementing functions like [hd] and [pairOut]. |

adamc@85 | 386 |

adam@480 | 387 This is the only new trick we need to learn to complete the proof. We can back up and give a short, automated proof (which again is safe to skip and uses Ltac features not introduced yet). *) |

adamc@85 | 388 |

adamc@85 | 389 Restart. |

adamc@85 | 390 |

adamc@85 | 391 induction e; crush; |

adamc@85 | 392 repeat (match goal with |

adam@405 | 393 | [ |- context[match cfold ?E with NConst _ => _ | _ => _ end] ] => |

adamc@213 | 394 dep_destruct (cfold E) |

adamc@213 | 395 | [ |- context[match pairOut (cfold ?E) with Some _ => _ |

adamc@213 | 396 | None => _ end] ] => |

adamc@213 | 397 dep_destruct (cfold E) |

adamc@85 | 398 | [ |- (if ?E then _ else _) = _ ] => destruct E |

adamc@85 | 399 end; crush). |

adamc@85 | 400 Qed. |

adamc@100 | 401 (* end thide *) |

adamc@86 | 402 |

adam@405 | 403 (** With this example, we get a first taste of how to build automated proofs that adapt automatically to changes in function definitions. *) |

adam@405 | 404 |

adamc@86 | 405 |

adam@338 | 406 (** * Dependently Typed Red-Black Trees *) |

adamc@94 | 407 |

adam@475 | 408 (** Red-black trees are a favorite purely functional data structure with an interesting invariant. We can use dependent types to guarantee that operations on red-black trees preserve the invariant. For simplicity, we specialize our red-black trees to represent sets of [nat]s. *) |

adamc@100 | 409 |

adamc@94 | 410 Inductive color : Set := Red | Black. |

adamc@94 | 411 |

adamc@94 | 412 Inductive rbtree : color -> nat -> Set := |

adamc@94 | 413 | Leaf : rbtree Black 0 |

adamc@214 | 414 | RedNode : forall n, rbtree Black n -> nat -> rbtree Black n -> rbtree Red n |

adamc@94 | 415 | BlackNode : forall c1 c2 n, rbtree c1 n -> nat -> rbtree c2 n -> rbtree Black (S n). |

adamc@94 | 416 |

adam@476 | 417 (** A value of type [rbtree c d] is a red-black tree whose root has color [c] and that has black depth [d]. The latter property means that there are exactly [d] black-colored nodes on any path from the root to a leaf. *) |

adamc@214 | 418 |

adamc@214 | 419 (** At first, it can be unclear that this choice of type indices tracks any useful property. To convince ourselves, we will prove that every red-black tree is balanced. We will phrase our theorem in terms of a depth calculating function that ignores the extra information in the types. It will be useful to parameterize this function over a combining operation, so that we can re-use the same code to calculate the minimum or maximum height among all paths from root to leaf. *) |

adamc@214 | 420 |

adamc@100 | 421 (* EX: Prove that every [rbtree] is balanced. *) |

adamc@100 | 422 |

adamc@100 | 423 (* begin thide *) |

adamc@95 | 424 Require Import Max Min. |

adamc@95 | 425 |

adamc@95 | 426 Section depth. |

adamc@95 | 427 Variable f : nat -> nat -> nat. |

adamc@95 | 428 |

adamc@214 | 429 Fixpoint depth c n (t : rbtree c n) : nat := |

adamc@95 | 430 match t with |

adamc@95 | 431 | Leaf => 0 |

adamc@95 | 432 | RedNode _ t1 _ t2 => S (f (depth t1) (depth t2)) |

adamc@95 | 433 | BlackNode _ _ _ t1 _ t2 => S (f (depth t1) (depth t2)) |

adamc@95 | 434 end. |

adamc@95 | 435 End depth. |

adamc@95 | 436 |

adam@338 | 437 (** Our proof of balanced-ness decomposes naturally into a lower bound and an upper bound. We prove the lower bound first. Unsurprisingly, a tree's black depth provides such a bound on the minimum path length. We use the richly typed procedure [min_dec] to do case analysis on whether [min X Y] equals [X] or [Y]. *) |

adamc@214 | 438 |

adam@283 | 439 Check min_dec. |

adam@283 | 440 (** %\vspace{-.15in}% [[ |

adam@283 | 441 min_dec |

adam@283 | 442 : forall n m : nat, {min n m = n} + {min n m = m} |

adam@302 | 443 ]] |

adam@302 | 444 *) |

adam@283 | 445 |

adamc@95 | 446 Theorem depth_min : forall c n (t : rbtree c n), depth min t >= n. |

adamc@95 | 447 induction t; crush; |

adamc@95 | 448 match goal with |

adamc@95 | 449 | [ |- context[min ?X ?Y] ] => destruct (min_dec X Y) |

adamc@95 | 450 end; crush. |

adamc@95 | 451 Qed. |

adamc@95 | 452 |

adamc@214 | 453 (** There is an analogous upper-bound theorem based on black depth. Unfortunately, a symmetric proof script does not suffice to establish it. *) |

adamc@214 | 454 |

adamc@214 | 455 Theorem depth_max : forall c n (t : rbtree c n), depth max t <= 2 * n + 1. |

adamc@214 | 456 induction t; crush; |

adamc@214 | 457 match goal with |

adamc@214 | 458 | [ |- context[max ?X ?Y] ] => destruct (max_dec X Y) |

adamc@214 | 459 end; crush. |

adamc@214 | 460 |

adamc@214 | 461 (** Two subgoals remain. One of them is: [[ |

adamc@214 | 462 n : nat |

adamc@214 | 463 t1 : rbtree Black n |

adamc@214 | 464 n0 : nat |

adamc@214 | 465 t2 : rbtree Black n |

adamc@214 | 466 IHt1 : depth max t1 <= n + (n + 0) + 1 |

adamc@214 | 467 IHt2 : depth max t2 <= n + (n + 0) + 1 |

adamc@214 | 468 e : max (depth max t1) (depth max t2) = depth max t1 |

adamc@214 | 469 ============================ |

adamc@214 | 470 S (depth max t1) <= n + (n + 0) + 1 |

adamc@214 | 471 |

adamc@214 | 472 ]] |

adamc@214 | 473 |

adam@398 | 474 We see that [IHt1] is _almost_ the fact we need, but it is not quite strong enough. We will need to strengthen our induction hypothesis to get the proof to go through. *) |

adamc@214 | 475 |

adamc@214 | 476 Abort. |

adamc@214 | 477 |

adamc@214 | 478 (** In particular, we prove a lemma that provides a stronger upper bound for trees with black root nodes. We got stuck above in a case about a red root node. Since red nodes have only black children, our IH strengthening will enable us to finish the proof. *) |

adamc@214 | 479 |

adamc@95 | 480 Lemma depth_max' : forall c n (t : rbtree c n), match c with |

adamc@95 | 481 | Red => depth max t <= 2 * n + 1 |

adamc@95 | 482 | Black => depth max t <= 2 * n |

adamc@95 | 483 end. |

adamc@95 | 484 induction t; crush; |

adamc@95 | 485 match goal with |

adamc@95 | 486 | [ |- context[max ?X ?Y] ] => destruct (max_dec X Y) |

adamc@100 | 487 end; crush; |

adamc@100 | 488 repeat (match goal with |

adamc@214 | 489 | [ H : context[match ?C with Red => _ | Black => _ end] |- _ ] => |

adamc@214 | 490 destruct C |

adamc@100 | 491 end; crush). |

adamc@95 | 492 Qed. |

adamc@95 | 493 |

adam@338 | 494 (** The original theorem follows easily from the lemma. We use the tactic %\index{tactics!generalize}%[generalize pf], which, when [pf] proves the proposition [P], changes the goal from [Q] to [P -> Q]. This transformation is useful because it makes the truth of [P] manifest syntactically, so that automation machinery can rely on [P], even if that machinery is not smart enough to establish [P] on its own. *) |

adamc@214 | 495 |

adamc@95 | 496 Theorem depth_max : forall c n (t : rbtree c n), depth max t <= 2 * n + 1. |

adamc@95 | 497 intros; generalize (depth_max' t); destruct c; crush. |

adamc@95 | 498 Qed. |

adamc@95 | 499 |

adamc@214 | 500 (** The final balance theorem establishes that the minimum and maximum path lengths of any tree are within a factor of two of each other. *) |

adamc@214 | 501 |

adamc@95 | 502 Theorem balanced : forall c n (t : rbtree c n), 2 * depth min t + 1 >= depth max t. |

adamc@95 | 503 intros; generalize (depth_min t); generalize (depth_max t); crush. |

adamc@95 | 504 Qed. |

adamc@100 | 505 (* end thide *) |

adamc@95 | 506 |

adamc@214 | 507 (** Now we are ready to implement an example operation on our trees, insertion. Insertion can be thought of as breaking the tree invariants locally but then rebalancing. In particular, in intermediate states we find red nodes that may have red children. The type [rtree] captures the idea of such a node, continuing to track black depth as a type index. *) |

adamc@95 | 508 |

adamc@94 | 509 Inductive rtree : nat -> Set := |

adamc@94 | 510 | RedNode' : forall c1 c2 n, rbtree c1 n -> nat -> rbtree c2 n -> rtree n. |

adamc@94 | 511 |

adam@338 | 512 (** Before starting to define [insert], we define predicates capturing when a data value is in the set represented by a normal or possibly invalid tree. *) |

adamc@214 | 513 |

adamc@96 | 514 Section present. |

adamc@96 | 515 Variable x : nat. |

adamc@96 | 516 |

adamc@214 | 517 Fixpoint present c n (t : rbtree c n) : Prop := |

adamc@96 | 518 match t with |

adamc@96 | 519 | Leaf => False |

adamc@96 | 520 | RedNode _ a y b => present a \/ x = y \/ present b |

adamc@96 | 521 | BlackNode _ _ _ a y b => present a \/ x = y \/ present b |

adamc@96 | 522 end. |

adamc@96 | 523 |

adamc@96 | 524 Definition rpresent n (t : rtree n) : Prop := |

adamc@96 | 525 match t with |

adamc@96 | 526 | RedNode' _ _ _ a y b => present a \/ x = y \/ present b |

adamc@96 | 527 end. |

adamc@96 | 528 End present. |

adamc@96 | 529 |

adam@338 | 530 (** Insertion relies on two balancing operations. It will be useful to give types to these operations using a relative of the subset types from last chapter. While subset types let us pair a value with a proof about that value, here we want to pair a value with another non-proof dependently typed value. The %\index{Gallina terms!sigT}%[sigT] type fills this role. *) |

adamc@214 | 531 |

adamc@100 | 532 Locate "{ _ : _ & _ }". |

adam@443 | 533 (** %\vspace{-.15in}%[[ |

adamc@214 | 534 Notation Scope |

adamc@214 | 535 "{ x : A & P }" := sigT (fun x : A => P) |

adam@302 | 536 ]] |

adam@302 | 537 *) |

adamc@214 | 538 |

adamc@100 | 539 Print sigT. |

adam@443 | 540 (** %\vspace{-.15in}%[[ |

adamc@214 | 541 Inductive sigT (A : Type) (P : A -> Type) : Type := |

adamc@214 | 542 existT : forall x : A, P x -> sigT P |

adam@302 | 543 ]] |

adam@302 | 544 *) |

adamc@214 | 545 |

adamc@214 | 546 (** It will be helpful to define a concise notation for the constructor of [sigT]. *) |

adamc@100 | 547 |

adamc@94 | 548 Notation "{< x >}" := (existT _ _ x). |

adamc@94 | 549 |

adamc@214 | 550 (** Each balance function is used to construct a new tree whose keys include the keys of two input trees, as well as a new key. One of the two input trees may violate the red-black alternation invariant (that is, it has an [rtree] type), while the other tree is known to be valid. Crucially, the two input trees have the same black depth. |

adamc@214 | 551 |

adam@338 | 552 A balance operation may return a tree whose root is of either color. Thus, we use a [sigT] type to package the result tree with the color of its root. Here is the definition of the first balance operation, which applies when the possibly invalid [rtree] belongs to the left of the valid [rbtree]. |

adam@338 | 553 |

adam@425 | 554 A quick word of encouragement: After writing this code, even I do not understand the precise details of how balancing works! I consulted Chris Okasaki's paper "Red-Black Trees in a Functional Setting" %\cite{Okasaki} %and transcribed the code to use dependent types. Luckily, the details are not so important here; types alone will tell us that insertion preserves balanced-ness, and we will prove that insertion produces trees containing the right keys.*) |

adamc@214 | 555 |

adamc@94 | 556 Definition balance1 n (a : rtree n) (data : nat) c2 := |

adamc@214 | 557 match a in rtree n return rbtree c2 n |

adamc@214 | 558 -> { c : color & rbtree c (S n) } with |

adam@380 | 559 | RedNode' _ c0 _ t1 y t2 => |

adam@380 | 560 match t1 in rbtree c n return rbtree c0 n -> rbtree c2 n |

adamc@214 | 561 -> { c : color & rbtree c (S n) } with |

adamc@214 | 562 | RedNode _ a x b => fun c d => |

adamc@214 | 563 {<RedNode (BlackNode a x b) y (BlackNode c data d)>} |

adamc@94 | 564 | t1' => fun t2 => |

adam@380 | 565 match t2 in rbtree c n return rbtree Black n -> rbtree c2 n |

adamc@214 | 566 -> { c : color & rbtree c (S n) } with |

adamc@214 | 567 | RedNode _ b x c => fun a d => |

adamc@214 | 568 {<RedNode (BlackNode a y b) x (BlackNode c data d)>} |

adamc@95 | 569 | b => fun a t => {<BlackNode (RedNode a y b) data t>} |

adamc@94 | 570 end t1' |

adamc@94 | 571 end t2 |

adamc@94 | 572 end. |

adamc@94 | 573 |

adam@405 | 574 (** We apply a trick that I call the%\index{convoy pattern}% _convoy pattern_. Recall that [match] annotations only make it possible to describe a dependence of a [match] _result type_ on the discriminee. There is no automatic refinement of the types of free variables. However, it is possible to effect such a refinement by finding a way to encode free variable type dependencies in the [match] result type, so that a [return] clause can express the connection. |

adamc@214 | 575 |

adam@425 | 576 In particular, we can extend the [match] to return _functions over the free variables whose types we want to refine_. In the case of [balance1], we only find ourselves wanting to refine the type of one tree variable at a time. We match on one subtree of a node, and we want the type of the other subtree to be refined based on what we learn. We indicate this with a [return] clause starting like [rbtree _ n -> ...], where [n] is bound in an [in] pattern. Such a [match] expression is applied immediately to the "old version" of the variable to be refined, and the type checker is happy. |

adamc@214 | 577 |

adam@338 | 578 Here is the symmetric function [balance2], for cases where the possibly invalid tree appears on the right rather than on the left. *) |

adamc@214 | 579 |

adamc@94 | 580 Definition balance2 n (a : rtree n) (data : nat) c2 := |

adamc@94 | 581 match a in rtree n return rbtree c2 n -> { c : color & rbtree c (S n) } with |

adam@380 | 582 | RedNode' _ c0 _ t1 z t2 => |

adam@380 | 583 match t1 in rbtree c n return rbtree c0 n -> rbtree c2 n |

adamc@214 | 584 -> { c : color & rbtree c (S n) } with |

adamc@214 | 585 | RedNode _ b y c => fun d a => |

adamc@214 | 586 {<RedNode (BlackNode a data b) y (BlackNode c z d)>} |

adamc@94 | 587 | t1' => fun t2 => |

adam@380 | 588 match t2 in rbtree c n return rbtree Black n -> rbtree c2 n |

adamc@214 | 589 -> { c : color & rbtree c (S n) } with |

adamc@214 | 590 | RedNode _ c z' d => fun b a => |

adamc@214 | 591 {<RedNode (BlackNode a data b) z (BlackNode c z' d)>} |

adamc@95 | 592 | b => fun a t => {<BlackNode t data (RedNode a z b)>} |

adamc@94 | 593 end t1' |

adamc@94 | 594 end t2 |

adamc@94 | 595 end. |

adamc@94 | 596 |

adamc@214 | 597 (** Now we are almost ready to get down to the business of writing an [insert] function. First, we enter a section that declares a variable [x], for the key we want to insert. *) |

adamc@214 | 598 |

adamc@94 | 599 Section insert. |

adamc@94 | 600 Variable x : nat. |

adamc@94 | 601 |

adamc@214 | 602 (** Most of the work of insertion is done by a helper function [ins], whose return types are expressed using a type-level function [insResult]. *) |

adamc@214 | 603 |

adamc@94 | 604 Definition insResult c n := |

adamc@94 | 605 match c with |

adamc@94 | 606 | Red => rtree n |

adamc@94 | 607 | Black => { c' : color & rbtree c' n } |

adamc@94 | 608 end. |

adamc@94 | 609 |

adam@338 | 610 (** That is, inserting into a tree with root color [c] and black depth [n], the variety of tree we get out depends on [c]. If we started with a red root, then we get back a possibly invalid tree of depth [n]. If we started with a black root, we get back a valid tree of depth [n] with a root node of an arbitrary color. |

adamc@214 | 611 |

adamc@214 | 612 Here is the definition of [ins]. Again, we do not want to dwell on the functional details. *) |

adamc@214 | 613 |

adamc@214 | 614 Fixpoint ins c n (t : rbtree c n) : insResult c n := |

adamc@214 | 615 match t with |

adamc@94 | 616 | Leaf => {< RedNode Leaf x Leaf >} |

adamc@94 | 617 | RedNode _ a y b => |

adamc@94 | 618 if le_lt_dec x y |

adamc@94 | 619 then RedNode' (projT2 (ins a)) y b |

adamc@94 | 620 else RedNode' a y (projT2 (ins b)) |

adamc@94 | 621 | BlackNode c1 c2 _ a y b => |

adamc@94 | 622 if le_lt_dec x y |

adamc@94 | 623 then |

adamc@94 | 624 match c1 return insResult c1 _ -> _ with |

adamc@94 | 625 | Red => fun ins_a => balance1 ins_a y b |

adamc@94 | 626 | _ => fun ins_a => {< BlackNode (projT2 ins_a) y b >} |

adamc@94 | 627 end (ins a) |

adamc@94 | 628 else |

adamc@94 | 629 match c2 return insResult c2 _ -> _ with |

adamc@94 | 630 | Red => fun ins_b => balance2 ins_b y a |

adamc@94 | 631 | _ => fun ins_b => {< BlackNode a y (projT2 ins_b) >} |

adamc@94 | 632 end (ins b) |

adamc@94 | 633 end. |

adamc@94 | 634 |

adam@479 | 635 (** The one new trick is a variation of the convoy pattern. In each of the last two pattern matches, we want to take advantage of the typing connection between the trees [a] and [b]. We might %\%naive%{}%ly apply the convoy pattern directly on [a] in the first [match] and on [b] in the second. This satisfies the type checker per se, but it does not satisfy the termination checker. Inside each [match], we would be calling [ins] recursively on a locally bound variable. The termination checker is not smart enough to trace the dataflow into that variable, so the checker does not know that this recursive argument is smaller than the original argument. We make this fact clearer by applying the convoy pattern on _the result of a recursive call_, rather than just on that call's argument. |

adamc@214 | 636 |

adamc@214 | 637 Finally, we are in the home stretch of our effort to define [insert]. We just need a few more definitions of non-recursive functions. First, we need to give the final characterization of [insert]'s return type. Inserting into a red-rooted tree gives a black-rooted tree where black depth has increased, and inserting into a black-rooted tree gives a tree where black depth has stayed the same and where the root is an arbitrary color. *) |

adamc@214 | 638 |

adamc@94 | 639 Definition insertResult c n := |

adamc@94 | 640 match c with |

adamc@94 | 641 | Red => rbtree Black (S n) |

adamc@94 | 642 | Black => { c' : color & rbtree c' n } |

adamc@94 | 643 end. |

adamc@94 | 644 |

adamc@214 | 645 (** A simple clean-up procedure translates [insResult]s into [insertResult]s. *) |

adamc@214 | 646 |

adamc@97 | 647 Definition makeRbtree c n : insResult c n -> insertResult c n := |

adamc@214 | 648 match c with |

adamc@94 | 649 | Red => fun r => |

adamc@214 | 650 match r with |

adamc@94 | 651 | RedNode' _ _ _ a x b => BlackNode a x b |

adamc@94 | 652 end |

adamc@94 | 653 | Black => fun r => r |

adamc@94 | 654 end. |

adamc@94 | 655 |

adamc@214 | 656 (** We modify Coq's default choice of implicit arguments for [makeRbtree], so that we do not need to specify the [c] and [n] arguments explicitly in later calls. *) |

adamc@214 | 657 |

adamc@97 | 658 Implicit Arguments makeRbtree [c n]. |

adamc@94 | 659 |

adamc@214 | 660 (** Finally, we define [insert] as a simple composition of [ins] and [makeRbtree]. *) |

adamc@214 | 661 |

adamc@94 | 662 Definition insert c n (t : rbtree c n) : insertResult c n := |

adamc@97 | 663 makeRbtree (ins t). |

adamc@94 | 664 |

adamc@214 | 665 (** As we noted earlier, the type of [insert] guarantees that it outputs balanced trees whose depths have not increased too much. We also want to know that [insert] operates correctly on trees interpreted as finite sets, so we finish this section with a proof of that fact. *) |

adamc@214 | 666 |

adamc@95 | 667 Section present. |

adamc@95 | 668 Variable z : nat. |

adamc@95 | 669 |

adamc@214 | 670 (** The variable [z] stands for an arbitrary key. We will reason about [z]'s presence in particular trees. As usual, outside the section the theorems we prove will quantify over all possible keys, giving us the facts we wanted. |

adamc@214 | 671 |

adam@367 | 672 We start by proving the correctness of the balance operations. It is useful to define a custom tactic [present_balance] that encapsulates the reasoning common to the two proofs. We use the keyword %\index{Vernacular commands!Ltac}%[Ltac] to assign a name to a proof script. This particular script just iterates between [crush] and identification of a tree that is being pattern-matched on and should be destructed. *) |

adamc@214 | 673 |

adamc@98 | 674 Ltac present_balance := |

adamc@98 | 675 crush; |

adamc@98 | 676 repeat (match goal with |

adam@425 | 677 | [ _ : context[match ?T with Leaf => _ | _ => _ end] |- _ ] => |

adam@425 | 678 dep_destruct T |

adam@405 | 679 | [ |- context[match ?T with Leaf => _ | _ => _ end] ] => dep_destruct T |

adamc@98 | 680 end; crush). |

adamc@98 | 681 |

adamc@214 | 682 (** The balance correctness theorems are simple first-order logic equivalences, where we use the function [projT2] to project the payload of a [sigT] value. *) |

adamc@214 | 683 |

adam@294 | 684 Lemma present_balance1 : forall n (a : rtree n) (y : nat) c2 (b : rbtree c2 n), |

adamc@95 | 685 present z (projT2 (balance1 a y b)) |

adamc@95 | 686 <-> rpresent z a \/ z = y \/ present z b. |

adamc@98 | 687 destruct a; present_balance. |

adamc@95 | 688 Qed. |

adamc@95 | 689 |

adamc@213 | 690 Lemma present_balance2 : forall n (a : rtree n) (y : nat) c2 (b : rbtree c2 n), |

adamc@95 | 691 present z (projT2 (balance2 a y b)) |

adamc@95 | 692 <-> rpresent z a \/ z = y \/ present z b. |

adamc@98 | 693 destruct a; present_balance. |

adamc@95 | 694 Qed. |

adamc@95 | 695 |

adamc@214 | 696 (** To state the theorem for [ins], it is useful to define a new type-level function, since [ins] returns different result types based on the type indices passed to it. Recall that [x] is the section variable standing for the key we are inserting. *) |

adamc@214 | 697 |

adamc@95 | 698 Definition present_insResult c n := |

adamc@95 | 699 match c return (rbtree c n -> insResult c n -> Prop) with |

adamc@95 | 700 | Red => fun t r => rpresent z r <-> z = x \/ present z t |

adamc@95 | 701 | Black => fun t r => present z (projT2 r) <-> z = x \/ present z t |

adamc@95 | 702 end. |

adamc@95 | 703 |

adamc@214 | 704 (** Now the statement and proof of the [ins] correctness theorem are straightforward, if verbose. We proceed by induction on the structure of a tree, followed by finding case analysis opportunities on expressions we see being analyzed in [if] or [match] expressions. After that, we pattern-match to find opportunities to use the theorems we proved about balancing. Finally, we identify two variables that are asserted by some hypothesis to be equal, and we use that hypothesis to replace one variable with the other everywhere. *) |

adamc@214 | 705 |

adamc@95 | 706 Theorem present_ins : forall c n (t : rbtree c n), |

adamc@95 | 707 present_insResult t (ins t). |

adamc@95 | 708 induction t; crush; |

adamc@95 | 709 repeat (match goal with |

adam@338 | 710 | [ _ : context[if ?E then _ else _] |- _ ] => destruct E |

adamc@95 | 711 | [ |- context[if ?E then _ else _] ] => destruct E |

adam@338 | 712 | [ _ : context[match ?C with Red => _ | Black => _ end] |

adamc@214 | 713 |- _ ] => destruct C |

adamc@95 | 714 end; crush); |

adamc@95 | 715 try match goal with |

adam@338 | 716 | [ _ : context[balance1 ?A ?B ?C] |- _ ] => |

adamc@95 | 717 generalize (present_balance1 A B C) |

adamc@95 | 718 end; |

adamc@95 | 719 try match goal with |

adam@338 | 720 | [ _ : context[balance2 ?A ?B ?C] |- _ ] => |

adamc@95 | 721 generalize (present_balance2 A B C) |

adamc@95 | 722 end; |

adamc@95 | 723 try match goal with |

adamc@95 | 724 | [ |- context[balance1 ?A ?B ?C] ] => |

adamc@95 | 725 generalize (present_balance1 A B C) |

adamc@95 | 726 end; |

adamc@95 | 727 try match goal with |

adamc@95 | 728 | [ |- context[balance2 ?A ?B ?C] ] => |

adamc@95 | 729 generalize (present_balance2 A B C) |

adamc@95 | 730 end; |

adamc@214 | 731 crush; |

adamc@95 | 732 match goal with |

adamc@95 | 733 | [ z : nat, x : nat |- _ ] => |

adamc@95 | 734 match goal with |

adamc@95 | 735 | [ H : z = x |- _ ] => rewrite H in *; clear H |

adamc@95 | 736 end |

adamc@95 | 737 end; |

adamc@95 | 738 tauto. |

adamc@95 | 739 Qed. |

adamc@95 | 740 |

adamc@214 | 741 (** The hard work is done. The most readable way to state correctness of [insert] involves splitting the property into two color-specific theorems. We write a tactic to encapsulate the reasoning steps that work to establish both facts. *) |

adamc@214 | 742 |

adamc@213 | 743 Ltac present_insert := |

adamc@213 | 744 unfold insert; intros n t; inversion t; |

adamc@97 | 745 generalize (present_ins t); simpl; |

adamc@97 | 746 dep_destruct (ins t); tauto. |

adamc@97 | 747 |

adamc@95 | 748 Theorem present_insert_Red : forall n (t : rbtree Red n), |

adamc@95 | 749 present z (insert t) |

adamc@95 | 750 <-> (z = x \/ present z t). |

adamc@213 | 751 present_insert. |

adamc@95 | 752 Qed. |

adamc@95 | 753 |

adamc@95 | 754 Theorem present_insert_Black : forall n (t : rbtree Black n), |

adamc@95 | 755 present z (projT2 (insert t)) |

adamc@95 | 756 <-> (z = x \/ present z t). |

adamc@213 | 757 present_insert. |

adamc@95 | 758 Qed. |

adamc@95 | 759 End present. |

adamc@94 | 760 End insert. |

adamc@94 | 761 |

adam@454 | 762 (** We can generate executable OCaml code with the command %\index{Vernacular commands!Recursive Extraction}%[Recursive Extraction insert], which also automatically outputs the OCaml versions of all of [insert]'s dependencies. In our previous extractions, we wound up with clean OCaml code. Here, we find uses of %\index{Obj.magic}%<<Obj.magic>>, OCaml's unsafe cast operator for tweaking the apparent type of an expression in an arbitrary way. Casts appear for this example because the return type of [insert] depends on the _value_ of the function's argument, a pattern that OCaml cannot handle. Since Coq's type system is much more expressive than OCaml's, such casts are unavoidable in general. Since the OCaml type-checker is no longer checking full safety of programs, we must rely on Coq's extractor to use casts only in provably safe ways. *) |

adam@338 | 763 |

adam@338 | 764 (* begin hide *) |

adam@338 | 765 Recursive Extraction insert. |

adam@338 | 766 (* end hide *) |

adam@283 | 767 |

adamc@94 | 768 |

adamc@86 | 769 (** * A Certified Regular Expression Matcher *) |

adamc@86 | 770 |

adamc@93 | 771 (** Another interesting example is regular expressions with dependent types that express which predicates over strings particular regexps implement. We can then assign a dependent type to a regular expression matching function, guaranteeing that it always decides the string property that we expect it to decide. |

adamc@93 | 772 |

adam@425 | 773 Before defining the syntax of expressions, it is helpful to define an inductive type capturing the meaning of the Kleene star. That is, a string [s] matches regular expression [star e] if and only if [s] can be decomposed into a sequence of substrings that all match [e]. We use Coq's string support, which comes through a combination of the [String] library and some parsing notations built into Coq. Operators like [++] and functions like [length] that we know from lists are defined again for strings. Notation scopes help us control which versions we want to use in particular contexts.%\index{Vernacular commands!Open Scope}% *) |

adamc@93 | 774 |

adamc@86 | 775 Require Import Ascii String. |

adamc@86 | 776 Open Scope string_scope. |

adamc@86 | 777 |

adamc@91 | 778 Section star. |

adamc@91 | 779 Variable P : string -> Prop. |

adamc@91 | 780 |

adamc@91 | 781 Inductive star : string -> Prop := |

adamc@91 | 782 | Empty : star "" |

adamc@91 | 783 | Iter : forall s1 s2, |

adamc@91 | 784 P s1 |

adamc@91 | 785 -> star s2 |

adamc@91 | 786 -> star (s1 ++ s2). |

adamc@91 | 787 End star. |

adamc@91 | 788 |

adam@480 | 789 (** Now we can make our first attempt at defining a [regexp] type that is indexed by predicates on strings, such that the index of a [regexp] tells us which language (string predicate) it recognizes. Here is a reasonable-looking definition that is restricted to constant characters and concatenation. We use the constructor [String], which is the analogue of list cons for the type [string], where [""] is like list nil. |

adamc@93 | 790 [[ |

adamc@93 | 791 Inductive regexp : (string -> Prop) -> Set := |

adamc@93 | 792 | Char : forall ch : ascii, |

adamc@93 | 793 regexp (fun s => s = String ch "") |

adamc@93 | 794 | Concat : forall (P1 P2 : string -> Prop) (r1 : regexp P1) (r2 : regexp P2), |

adamc@93 | 795 regexp (fun s => exists s1, exists s2, s = s1 ++ s2 /\ P1 s1 /\ P2 s2). |

adamc@93 | 796 ]] |

adamc@93 | 797 |

adam@338 | 798 << |

adam@338 | 799 User error: Large non-propositional inductive types must be in Type |

adam@338 | 800 >> |

adam@338 | 801 |

adam@454 | 802 What is a %\index{large inductive types}%large inductive type? In Coq, it is an inductive type that has a constructor that quantifies over some type of type [Type]. We have not worked with [Type] very much to this point. Every term of CIC has a type, including [Set] and [Prop], which are assigned type [Type]. The type [string -> Prop] from the failed definition also has type [Type]. |

adamc@93 | 803 |

adamc@93 | 804 It turns out that allowing large inductive types in [Set] leads to contradictions when combined with certain kinds of classical logic reasoning. Thus, by default, such types are ruled out. There is a simple fix for our [regexp] definition, which is to place our new type in [Type]. While fixing the problem, we also expand the list of constructors to cover the remaining regular expression operators. *) |

adamc@93 | 805 |

adamc@89 | 806 Inductive regexp : (string -> Prop) -> Type := |

adamc@86 | 807 | Char : forall ch : ascii, |

adamc@86 | 808 regexp (fun s => s = String ch "") |

adamc@86 | 809 | Concat : forall P1 P2 (r1 : regexp P1) (r2 : regexp P2), |

adamc@87 | 810 regexp (fun s => exists s1, exists s2, s = s1 ++ s2 /\ P1 s1 /\ P2 s2) |

adamc@87 | 811 | Or : forall P1 P2 (r1 : regexp P1) (r2 : regexp P2), |

adamc@91 | 812 regexp (fun s => P1 s \/ P2 s) |

adamc@91 | 813 | Star : forall P (r : regexp P), |

adamc@91 | 814 regexp (star P). |

adamc@86 | 815 |

adam@425 | 816 (** Many theorems about strings are useful for implementing a certified regexp matcher, and few of them are in the [String] library. The book source includes statements, proofs, and hint commands for a handful of such omitted theorems. Since they are orthogonal to our use of dependent types, we hide them in the rendered versions of this book. *) |

adamc@93 | 817 |

adamc@93 | 818 (* begin hide *) |

adamc@86 | 819 Open Scope specif_scope. |

adamc@86 | 820 |

adamc@86 | 821 Lemma length_emp : length "" <= 0. |

adamc@86 | 822 crush. |

adamc@86 | 823 Qed. |

adamc@86 | 824 |

adamc@86 | 825 Lemma append_emp : forall s, s = "" ++ s. |

adamc@86 | 826 crush. |

adamc@86 | 827 Qed. |

adamc@86 | 828 |

adamc@86 | 829 Ltac substring := |

adamc@86 | 830 crush; |

adamc@86 | 831 repeat match goal with |

adamc@86 | 832 | [ |- context[match ?N with O => _ | S _ => _ end] ] => destruct N; crush |

adamc@86 | 833 end. |

adamc@86 | 834 |

adamc@86 | 835 Lemma substring_le : forall s n m, |

adamc@86 | 836 length (substring n m s) <= m. |

adamc@86 | 837 induction s; substring. |

adamc@86 | 838 Qed. |

adamc@86 | 839 |

adamc@86 | 840 Lemma substring_all : forall s, |

adamc@86 | 841 substring 0 (length s) s = s. |

adamc@86 | 842 induction s; substring. |

adamc@86 | 843 Qed. |

adamc@86 | 844 |

adamc@86 | 845 Lemma substring_none : forall s n, |

adamc@93 | 846 substring n 0 s = "". |

adamc@86 | 847 induction s; substring. |

adamc@86 | 848 Qed. |

adamc@86 | 849 |

adam@375 | 850 Hint Rewrite substring_all substring_none. |

adamc@86 | 851 |

adamc@86 | 852 Lemma substring_split : forall s m, |

adamc@86 | 853 substring 0 m s ++ substring m (length s - m) s = s. |

adamc@86 | 854 induction s; substring. |

adamc@86 | 855 Qed. |

adamc@86 | 856 |

adamc@86 | 857 Lemma length_app1 : forall s1 s2, |

adamc@86 | 858 length s1 <= length (s1 ++ s2). |

adamc@86 | 859 induction s1; crush. |

adamc@86 | 860 Qed. |

adamc@86 | 861 |

adamc@86 | 862 Hint Resolve length_emp append_emp substring_le substring_split length_app1. |

adamc@86 | 863 |

adamc@86 | 864 Lemma substring_app_fst : forall s2 s1 n, |

adamc@86 | 865 length s1 = n |

adamc@86 | 866 -> substring 0 n (s1 ++ s2) = s1. |

adamc@86 | 867 induction s1; crush. |

adamc@86 | 868 Qed. |

adamc@86 | 869 |

adamc@86 | 870 Lemma substring_app_snd : forall s2 s1 n, |

adamc@86 | 871 length s1 = n |

adamc@86 | 872 -> substring n (length (s1 ++ s2) - n) (s1 ++ s2) = s2. |

adam@375 | 873 Hint Rewrite <- minus_n_O. |

adamc@86 | 874 |

adamc@86 | 875 induction s1; crush. |

adamc@86 | 876 Qed. |

adamc@86 | 877 |

adam@375 | 878 Hint Rewrite substring_app_fst substring_app_snd using solve [trivial]. |

adamc@93 | 879 (* end hide *) |

adamc@93 | 880 |

adamc@93 | 881 (** A few auxiliary functions help us in our final matcher definition. The function [split] will be used to implement the regexp concatenation case. *) |

adamc@86 | 882 |

adamc@86 | 883 Section split. |

adamc@86 | 884 Variables P1 P2 : string -> Prop. |

adamc@214 | 885 Variable P1_dec : forall s, {P1 s} + {~ P1 s}. |

adamc@214 | 886 Variable P2_dec : forall s, {P2 s} + {~ P2 s}. |

adamc@93 | 887 (** We require a choice of two arbitrary string predicates and functions for deciding them. *) |

adamc@86 | 888 |

adamc@86 | 889 Variable s : string. |

adamc@93 | 890 (** Our computation will take place relative to a single fixed string, so it is easiest to make it a [Variable], rather than an explicit argument to our functions. *) |

adamc@93 | 891 |

adam@338 | 892 (** The function [split'] is the workhorse behind [split]. It searches through the possible ways of splitting [s] into two pieces, checking the two predicates against each such pair. The execution of [split'] progresses right-to-left, from splitting all of [s] into the first piece to splitting all of [s] into the second piece. It takes an extra argument, [n], which specifies how far along we are in this search process. *) |

adamc@86 | 893 |

adam@297 | 894 Definition split' : forall n : nat, n <= length s |

adamc@86 | 895 -> {exists s1, exists s2, length s1 <= n /\ s1 ++ s2 = s /\ P1 s1 /\ P2 s2} |

adamc@214 | 896 + {forall s1 s2, length s1 <= n -> s1 ++ s2 = s -> ~ P1 s1 \/ ~ P2 s2}. |

adamc@86 | 897 refine (fix F (n : nat) : n <= length s |

adamc@86 | 898 -> {exists s1, exists s2, length s1 <= n /\ s1 ++ s2 = s /\ P1 s1 /\ P2 s2} |

adamc@214 | 899 + {forall s1 s2, length s1 <= n -> s1 ++ s2 = s -> ~ P1 s1 \/ ~ P2 s2} := |

adamc@214 | 900 match n with |

adamc@86 | 901 | O => fun _ => Reduce (P1_dec "" && P2_dec s) |

adamc@93 | 902 | S n' => fun _ => (P1_dec (substring 0 (S n') s) |

adamc@93 | 903 && P2_dec (substring (S n') (length s - S n') s)) |

adamc@86 | 904 || F n' _ |

adamc@86 | 905 end); clear F; crush; eauto 7; |

adamc@86 | 906 match goal with |

adamc@86 | 907 | [ _ : length ?S <= 0 |- _ ] => destruct S |

adam@338 | 908 | [ _ : length ?S' <= S ?N |- _ ] => destruct (eq_nat_dec (length S') (S N)) |

adamc@86 | 909 end; crush. |

adamc@86 | 910 Defined. |

adamc@86 | 911 |

adam@338 | 912 (** There is one subtle point in the [split'] code that is worth mentioning. The main body of the function is a [match] on [n]. In the case where [n] is known to be [S n'], we write [S n'] in several places where we might be tempted to write [n]. However, without further work to craft proper [match] annotations, the type-checker does not use the equality between [n] and [S n']. Thus, it is common to see patterns repeated in [match] case bodies in dependently typed Coq code. We can at least use a [let] expression to avoid copying the pattern more than once, replacing the first case body with: |

adamc@93 | 913 [[ |

adamc@93 | 914 | S n' => fun _ => let n := S n' in |

adamc@93 | 915 (P1_dec (substring 0 n s) |

adamc@93 | 916 && P2_dec (substring n (length s - n) s)) |

adamc@93 | 917 || F n' _ |

adamc@93 | 918 ]] |

adamc@93 | 919 |

adam@338 | 920 The [split] function itself is trivial to implement in terms of [split']. We just ask [split'] to begin its search with [n = length s]. *) |

adamc@93 | 921 |

adamc@86 | 922 Definition split : {exists s1, exists s2, s = s1 ++ s2 /\ P1 s1 /\ P2 s2} |

adamc@214 | 923 + {forall s1 s2, s = s1 ++ s2 -> ~ P1 s1 \/ ~ P2 s2}. |

adamc@86 | 924 refine (Reduce (split' (n := length s) _)); crush; eauto. |

adamc@86 | 925 Defined. |

adamc@86 | 926 End split. |

adamc@86 | 927 |

adamc@86 | 928 Implicit Arguments split [P1 P2]. |

adamc@86 | 929 |

adamc@93 | 930 (* begin hide *) |

adamc@91 | 931 Lemma app_empty_end : forall s, s ++ "" = s. |

adamc@91 | 932 induction s; crush. |

adamc@91 | 933 Qed. |

adamc@91 | 934 |

adam@375 | 935 Hint Rewrite app_empty_end. |

adamc@91 | 936 |

adamc@91 | 937 Lemma substring_self : forall s n, |

adamc@91 | 938 n <= 0 |

adamc@91 | 939 -> substring n (length s - n) s = s. |

adamc@91 | 940 induction s; substring. |

adamc@91 | 941 Qed. |

adamc@91 | 942 |

adamc@91 | 943 Lemma substring_empty : forall s n m, |

adamc@91 | 944 m <= 0 |

adamc@91 | 945 -> substring n m s = "". |

adamc@91 | 946 induction s; substring. |

adamc@91 | 947 Qed. |

adamc@91 | 948 |

adam@375 | 949 Hint Rewrite substring_self substring_empty using omega. |

adamc@91 | 950 |

adamc@91 | 951 Lemma substring_split' : forall s n m, |

adamc@91 | 952 substring n m s ++ substring (n + m) (length s - (n + m)) s |

adamc@91 | 953 = substring n (length s - n) s. |

adam@375 | 954 Hint Rewrite substring_split. |

adamc@91 | 955 |

adamc@91 | 956 induction s; substring. |

adamc@91 | 957 Qed. |

adamc@91 | 958 |

adamc@91 | 959 Lemma substring_stack : forall s n2 m1 m2, |

adamc@91 | 960 m1 <= m2 |

adamc@91 | 961 -> substring 0 m1 (substring n2 m2 s) |

adamc@91 | 962 = substring n2 m1 s. |

adamc@91 | 963 induction s; substring. |

adamc@91 | 964 Qed. |

adamc@91 | 965 |

adamc@91 | 966 Ltac substring' := |

adamc@91 | 967 crush; |

adamc@91 | 968 repeat match goal with |

adamc@91 | 969 | [ |- context[match ?N with O => _ | S _ => _ end] ] => case_eq N; crush |

adamc@91 | 970 end. |

adamc@91 | 971 |

adamc@91 | 972 Lemma substring_stack' : forall s n1 n2 m1 m2, |

adamc@91 | 973 n1 + m1 <= m2 |

adamc@91 | 974 -> substring n1 m1 (substring n2 m2 s) |

adamc@91 | 975 = substring (n1 + n2) m1 s. |

adamc@91 | 976 induction s; substring'; |

adamc@91 | 977 match goal with |

adamc@91 | 978 | [ |- substring ?N1 _ _ = substring ?N2 _ _ ] => |

adamc@91 | 979 replace N1 with N2; crush |

adamc@91 | 980 end. |

adamc@91 | 981 Qed. |

adamc@91 | 982 |

adamc@91 | 983 Lemma substring_suffix : forall s n, |

adamc@91 | 984 n <= length s |

adamc@91 | 985 -> length (substring n (length s - n) s) = length s - n. |

adamc@91 | 986 induction s; substring. |

adamc@91 | 987 Qed. |

adamc@91 | 988 |

adamc@91 | 989 Lemma substring_suffix_emp' : forall s n m, |

adamc@91 | 990 substring n (S m) s = "" |

adamc@91 | 991 -> n >= length s. |

adamc@91 | 992 induction s; crush; |

adamc@91 | 993 match goal with |

adamc@91 | 994 | [ |- ?N >= _ ] => destruct N; crush |

adamc@91 | 995 end; |

adamc@91 | 996 match goal with |

adamc@91 | 997 [ |- S ?N >= S ?E ] => assert (N >= E); [ eauto | omega ] |

adamc@91 | 998 end. |

adamc@91 | 999 Qed. |

adamc@91 | 1000 |

adamc@91 | 1001 Lemma substring_suffix_emp : forall s n m, |

adamc@92 | 1002 substring n m s = "" |

adamc@92 | 1003 -> m > 0 |

adamc@91 | 1004 -> n >= length s. |

adam@335 | 1005 destruct m as [ | m]; [crush | intros; apply substring_suffix_emp' with m; assumption]. |

adamc@91 | 1006 Qed. |

adamc@91 | 1007 |

adamc@91 | 1008 Hint Rewrite substring_stack substring_stack' substring_suffix |

adam@375 | 1009 using omega. |

adamc@91 | 1010 |

adamc@91 | 1011 Lemma minus_minus : forall n m1 m2, |

adamc@91 | 1012 m1 + m2 <= n |

adamc@91 | 1013 -> n - m1 - m2 = n - (m1 + m2). |

adamc@91 | 1014 intros; omega. |

adamc@91 | 1015 Qed. |

adamc@91 | 1016 |

adamc@91 | 1017 Lemma plus_n_Sm' : forall n m : nat, S (n + m) = m + S n. |

adamc@91 | 1018 intros; omega. |

adamc@91 | 1019 Qed. |

adamc@91 | 1020 |

adam@375 | 1021 Hint Rewrite minus_minus using omega. |

adamc@93 | 1022 (* end hide *) |

adamc@93 | 1023 |

adamc@93 | 1024 (** One more helper function will come in handy: [dec_star], for implementing another linear search through ways of splitting a string, this time for implementing the Kleene star. *) |

adamc@91 | 1025 |

adamc@91 | 1026 Section dec_star. |

adamc@91 | 1027 Variable P : string -> Prop. |

adamc@214 | 1028 Variable P_dec : forall s, {P s} + {~ P s}. |

adamc@91 | 1029 |

adam@338 | 1030 (** Some new lemmas and hints about the [star] type family are useful. We omit them here; they are included in the book source at this point. *) |

adamc@93 | 1031 |

adamc@93 | 1032 (* begin hide *) |

adamc@91 | 1033 Hint Constructors star. |

adamc@91 | 1034 |

adamc@91 | 1035 Lemma star_empty : forall s, |

adamc@91 | 1036 length s = 0 |

adamc@91 | 1037 -> star P s. |

adamc@91 | 1038 destruct s; crush. |

adamc@91 | 1039 Qed. |

adamc@91 | 1040 |

adamc@91 | 1041 Lemma star_singleton : forall s, P s -> star P s. |

adamc@91 | 1042 intros; rewrite <- (app_empty_end s); auto. |

adamc@91 | 1043 Qed. |

adamc@91 | 1044 |

adamc@91 | 1045 Lemma star_app : forall s n m, |

adamc@91 | 1046 P (substring n m s) |

adamc@91 | 1047 -> star P (substring (n + m) (length s - (n + m)) s) |

adamc@91 | 1048 -> star P (substring n (length s - n) s). |

adamc@91 | 1049 induction n; substring; |

adamc@91 | 1050 match goal with |

adamc@91 | 1051 | [ H : P (substring ?N ?M ?S) |- _ ] => |

adamc@91 | 1052 solve [ rewrite <- (substring_split S M); auto |

adamc@91 | 1053 | rewrite <- (substring_split' S N M); auto ] |

adamc@91 | 1054 end. |

adamc@91 | 1055 Qed. |

adamc@91 | 1056 |

adamc@91 | 1057 Hint Resolve star_empty star_singleton star_app. |

adamc@91 | 1058 |

adamc@91 | 1059 Variable s : string. |

adamc@91 | 1060 |

adamc@91 | 1061 Lemma star_inv : forall s, |

adamc@91 | 1062 star P s |

adamc@91 | 1063 -> s = "" |

adamc@91 | 1064 \/ exists i, i < length s |

adamc@91 | 1065 /\ P (substring 0 (S i) s) |

adamc@91 | 1066 /\ star P (substring (S i) (length s - S i) s). |

adamc@91 | 1067 Hint Extern 1 (exists i : nat, _) => |

adamc@91 | 1068 match goal with |

adamc@91 | 1069 | [ H : P (String _ ?S) |- _ ] => exists (length S); crush |

adamc@91 | 1070 end. |

adamc@91 | 1071 |

adamc@91 | 1072 induction 1; [ |

adamc@91 | 1073 crush |

adamc@91 | 1074 | match goal with |

adamc@91 | 1075 | [ _ : P ?S |- _ ] => destruct S; crush |

adamc@91 | 1076 end |

adamc@91 | 1077 ]. |

adamc@91 | 1078 Qed. |

adamc@91 | 1079 |

adamc@91 | 1080 Lemma star_substring_inv : forall n, |

adamc@91 | 1081 n <= length s |

adamc@91 | 1082 -> star P (substring n (length s - n) s) |

adamc@91 | 1083 -> substring n (length s - n) s = "" |

adamc@91 | 1084 \/ exists l, l < length s - n |

adamc@91 | 1085 /\ P (substring n (S l) s) |

adamc@91 | 1086 /\ star P (substring (n + S l) (length s - (n + S l)) s). |

adam@375 | 1087 Hint Rewrite plus_n_Sm'. |

adamc@91 | 1088 |

adamc@91 | 1089 intros; |

adamc@91 | 1090 match goal with |

adamc@91 | 1091 | [ H : star _ _ |- _ ] => generalize (star_inv H); do 3 crush; eauto |

adamc@91 | 1092 end. |

adamc@91 | 1093 Qed. |

adamc@93 | 1094 (* end hide *) |

adamc@93 | 1095 |

adamc@93 | 1096 (** The function [dec_star''] implements a single iteration of the star. That is, it tries to find a string prefix matching [P], and it calls a parameter function on the remainder of the string. *) |

adamc@91 | 1097 |

adamc@91 | 1098 Section dec_star''. |

adamc@91 | 1099 Variable n : nat. |

adam@454 | 1100 (** Variable [n] is the length of the prefix of [s] that we have already processed. *) |

adamc@91 | 1101 |

adamc@91 | 1102 Variable P' : string -> Prop. |

adamc@91 | 1103 Variable P'_dec : forall n' : nat, n' > n |

adamc@91 | 1104 -> {P' (substring n' (length s - n') s)} |

adamc@214 | 1105 + {~ P' (substring n' (length s - n') s)}. |

adam@475 | 1106 |

adamc@93 | 1107 (** When we use [dec_star''], we will instantiate [P'_dec] with a function for continuing the search for more instances of [P] in [s]. *) |

adamc@93 | 1108 |

adamc@93 | 1109 (** Now we come to [dec_star''] itself. It takes as an input a natural [l] that records how much of the string has been searched so far, as we did for [split']. The return type expresses that [dec_star''] is looking for an index into [s] that splits [s] into a nonempty prefix and a suffix, such that the prefix satisfies [P] and the suffix satisfies [P']. *) |

adamc@91 | 1110 |

adam@297 | 1111 Definition dec_star'' : forall l : nat, |

adam@297 | 1112 {exists l', S l' <= l |

adamc@91 | 1113 /\ P (substring n (S l') s) /\ P' (substring (n + S l') (length s - (n + S l')) s)} |

adamc@91 | 1114 + {forall l', S l' <= l |

adamc@214 | 1115 -> ~ P (substring n (S l') s) |

adamc@214 | 1116 \/ ~ P' (substring (n + S l') (length s - (n + S l')) s)}. |

adamc@91 | 1117 refine (fix F (l : nat) : {exists l', S l' <= l |

adam@480 | 1118 /\ P (substring n (S l') s) /\ P' (substring (n + S l') (length s - (n + S l')) s)} |

adam@480 | 1119 + {forall l', S l' <= l |

adam@480 | 1120 -> ~ P (substring n (S l') s) |

adam@480 | 1121 \/ ~ P' (substring (n + S l') (length s - (n + S l')) s)} := |

adam@480 | 1122 match l with |

adam@480 | 1123 | O => _ |

adam@480 | 1124 | S l' => |

adam@480 | 1125 (P_dec (substring n (S l') s) && P'_dec (n' := n + S l') _) |

adam@480 | 1126 || F l' |

adam@480 | 1127 end); clear F; crush; eauto 7; |

adam@480 | 1128 match goal with |

adam@480 | 1129 | [ H : ?X <= S ?Y |- _ ] => destruct (eq_nat_dec X (S Y)); crush |

adam@480 | 1130 end. |

adamc@91 | 1131 Defined. |

adamc@91 | 1132 End dec_star''. |

adamc@91 | 1133 |

adamc@93 | 1134 (* begin hide *) |

adamc@92 | 1135 Lemma star_length_contra : forall n, |

adamc@92 | 1136 length s > n |

adamc@92 | 1137 -> n >= length s |

adamc@92 | 1138 -> False. |

adamc@92 | 1139 crush. |

adamc@92 | 1140 Qed. |

adamc@92 | 1141 |

adamc@92 | 1142 Lemma star_length_flip : forall n n', |

adamc@92 | 1143 length s - n <= S n' |

adamc@92 | 1144 -> length s > n |

adamc@92 | 1145 -> length s - n > 0. |

adamc@92 | 1146 crush. |

adamc@92 | 1147 Qed. |

adamc@92 | 1148 |

adamc@92 | 1149 Hint Resolve star_length_contra star_length_flip substring_suffix_emp. |

adamc@93 | 1150 (* end hide *) |

adamc@92 | 1151 |

adamc@93 | 1152 (** The work of [dec_star''] is nested inside another linear search by [dec_star'], which provides the final functionality we need, but for arbitrary suffixes of [s], rather than just for [s] overall. *) |

adamc@93 | 1153 |

adam@297 | 1154 Definition dec_star' : forall n n' : nat, length s - n' <= n |

adamc@91 | 1155 -> {star P (substring n' (length s - n') s)} |

adamc@214 | 1156 + {~ star P (substring n' (length s - n') s)}. |

adamc@214 | 1157 refine (fix F (n n' : nat) : length s - n' <= n |

adamc@91 | 1158 -> {star P (substring n' (length s - n') s)} |

adamc@214 | 1159 + {~ star P (substring n' (length s - n') s)} := |

adamc@214 | 1160 match n with |

adamc@91 | 1161 | O => fun _ => Yes |

adamc@91 | 1162 | S n'' => fun _ => |

adamc@91 | 1163 le_gt_dec (length s) n' |

adam@338 | 1164 || dec_star'' (n := n') (star P) |

adam@338 | 1165 (fun n0 _ => Reduce (F n'' n0 _)) (length s - n') |

adamc@92 | 1166 end); clear F; crush; eauto; |

adamc@92 | 1167 match goal with |

adamc@92 | 1168 | [ H : star _ _ |- _ ] => apply star_substring_inv in H; crush; eauto |

adamc@92 | 1169 end; |

adamc@92 | 1170 match goal with |

adamc@92 | 1171 | [ H1 : _ < _ - _, H2 : forall l' : nat, _ <= _ - _ -> _ |- _ ] => |

adamc@92 | 1172 generalize (H2 _ (lt_le_S _ _ H1)); tauto |

adamc@92 | 1173 end. |

adamc@91 | 1174 Defined. |

adamc@91 | 1175 |

adam@380 | 1176 (** Finally, we have [dec_star], defined by straightforward reduction from [dec_star']. *) |

adamc@93 | 1177 |

adamc@214 | 1178 Definition dec_star : {star P s} + {~ star P s}. |

adam@380 | 1179 refine (Reduce (dec_star' (n := length s) 0 _)); crush. |

adamc@91 | 1180 Defined. |

adamc@91 | 1181 End dec_star. |

adamc@91 | 1182 |

adamc@93 | 1183 (* begin hide *) |

adamc@86 | 1184 Lemma app_cong : forall x1 y1 x2 y2, |

adamc@86 | 1185 x1 = x2 |

adamc@86 | 1186 -> y1 = y2 |

adamc@86 | 1187 -> x1 ++ y1 = x2 ++ y2. |

adamc@86 | 1188 congruence. |

adamc@86 | 1189 Qed. |

adamc@86 | 1190 |

adamc@86 | 1191 Hint Resolve app_cong. |

adamc@93 | 1192 (* end hide *) |

adamc@93 | 1193 |

adamc@93 | 1194 (** With these helper functions completed, the implementation of our [matches] function is refreshingly straightforward. We only need one small piece of specific tactic work beyond what [crush] does for us. *) |

adamc@86 | 1195 |

adam@297 | 1196 Definition matches : forall P (r : regexp P) s, {P s} + {~ P s}. |

adamc@214 | 1197 refine (fix F P (r : regexp P) s : {P s} + {~ P s} := |

adamc@86 | 1198 match r with |

adamc@86 | 1199 | Char ch => string_dec s (String ch "") |

adamc@86 | 1200 | Concat _ _ r1 r2 => Reduce (split (F _ r1) (F _ r2) s) |

adamc@87 | 1201 | Or _ _ r1 r2 => F _ r1 s || F _ r2 s |

adamc@91 | 1202 | Star _ r => dec_star _ _ _ |

adamc@86 | 1203 end); crush; |

adamc@86 | 1204 match goal with |

adam@426 | 1205 | [ H : _ |- _ ] => generalize (H _ _ (eq_refl _)) |

adamc@93 | 1206 end; tauto. |

adamc@86 | 1207 Defined. |

adamc@86 | 1208 |

adam@283 | 1209 (** It is interesting to pause briefly to consider alternate implementations of [matches]. Dependent types give us much latitude in how specific correctness properties may be encoded with types. For instance, we could have made [regexp] a non-indexed inductive type, along the lines of what is possible in traditional ML and Haskell. We could then have implemented a recursive function to map [regexp]s to their intended meanings, much as we have done with types and programs in other examples. That style is compatible with the [refine]-based approach that we have used here, and it might be an interesting exercise to redo the code from this subsection in that alternate style or some further encoding of the reader's choice. The main advantage of indexed inductive types is that they generally lead to the smallest amount of code. *) |

adam@283 | 1210 |

adamc@93 | 1211 (* begin hide *) |

adamc@86 | 1212 Example hi := Concat (Char "h"%char) (Char "i"%char). |

adam@380 | 1213 Eval hnf in matches hi "hi". |

adam@380 | 1214 Eval hnf in matches hi "bye". |

adamc@87 | 1215 |

adamc@87 | 1216 Example a_b := Or (Char "a"%char) (Char "b"%char). |

adam@380 | 1217 Eval hnf in matches a_b "". |

adam@380 | 1218 Eval hnf in matches a_b "a". |

adam@380 | 1219 Eval hnf in matches a_b "aa". |

adam@380 | 1220 Eval hnf in matches a_b "b". |

adam@283 | 1221 (* end hide *) |

adam@283 | 1222 |

adam@454 | 1223 (** Many regular expression matching problems are easy to test. The reader may run each of the following queries to verify that it gives the correct answer. We use evaluation strategy %\index{tactics!hnf}%[hnf] to reduce each term to%\index{head-normal form}% _head-normal form_, where the datatype constructor used to build its value is known. (Further reduction would involve wasteful simplification of proof terms justifying the answers of our procedures.) *) |

adamc@91 | 1224 |

adamc@91 | 1225 Example a_star := Star (Char "a"%char). |

adam@380 | 1226 Eval hnf in matches a_star "". |

adam@380 | 1227 Eval hnf in matches a_star "a". |

adam@380 | 1228 Eval hnf in matches a_star "b". |

adam@380 | 1229 Eval hnf in matches a_star "aa". |

adam@283 | 1230 |

adam@283 | 1231 (** Evaluation inside Coq does not scale very well, so it is easy to build other tests that run for hours or more. Such cases are better suited to execution with the extracted OCaml code. *) |