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More maint & debug code

author | Adam Chlipala <adamc@hcoop.net> |
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date | Mon, 07 Dec 2009 16:42:42 -0500 |

parents | 0a2146dafa8e |

children | b28c6e6eca0c |

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(* Copyright (c) 2009, Adam Chlipala * * This work is licensed under a * Creative Commons Attribution-Noncommercial-No Derivative Works 3.0 * Unported License. * The license text is available at: * http://creativecommons.org/licenses/by-nc-nd/3.0/ *) (* begin hide *) Require Import Arith. Require Import Tactics. Set Implicit Arguments. (* end hide *) (** %\chapter{Proving in the Large}% *) (** It is somewhat unfortunate that the term "theorem-proving" looks so much like the word "theory." Most researchers and practitioners in software assume that mechanized theorem-proving is profoundly impractical. Indeed, until recently, most advances in theorem-proving for higher-order logics have been largely theoretical. However, starting around the beginning of the 21st century, there was a surge in the use of proof assistants in serious verification efforts. That line of work is still quite new, but I believe it is not too soon to distill some lessons on how to work effectively with large formal proofs. Thus, this chapter gives some tips for structuring and maintaining large Coq developments. *) (** * Ltac Anti-Patterns *) (** In this book, I have been following an unusual style, where proofs are not considered finished until they are "fully automated," in a certain sense. SEach such theorem is proved by a single tactic. Since Ltac is a Turing-complete programming language, it is not hard to squeeze arbitrary heuristics into single tactics, using operators like the semicolon to combine steps. In contrast, most Ltac proofs "in the wild" consist of many steps, performed by individual tactics followed by periods. Is it really worth drawing a distinction between proof steps terminated by semicolons and steps terminated by periods? I argue that this is, in fact, a very important distinction, with serious consequences for a majority of important verification domains. The more uninteresting drudge work a proof domain involves, the more important it is to work to prove theorems with single tactics. From an automation standpoint, single-tactic proofs can be extremely effective, and automation becomes more and more critical as proofs are populated by more uninteresting detail. In this section, I will give some examples of the consequences of more common proof styles. As a running example, consider a basic language of arithmetic expressions, an interpreter for it, and a transformation that scales up every constant in an expression. *) Inductive exp : Set := | Const : nat -> exp | Plus : exp -> exp -> exp. Fixpoint eval (e : exp) : nat := match e with | Const n => n | Plus e1 e2 => eval e1 + eval e2 end. Fixpoint times (k : nat) (e : exp) : exp := match e with | Const n => Const (k * n) | Plus e1 e2 => Plus (times k e1) (times k e2) end. (** We can write a very manual proof that [double] really doubles an expression's value. *) Theorem eval_times : forall k e, eval (times k e) = k * eval e. induction e. trivial. simpl. rewrite IHe1. rewrite IHe2. rewrite mult_plus_distr_l. trivial. Qed. (** We use spaces to separate the two inductive cases. The second case mentions automatically-generated hypothesis names explicitly. As a result, innocuous changes to the theorem statement can invalidate the proof. *) Reset eval_times. Theorem eval_double : forall k x, eval (times k x) = k * eval x. induction x. trivial. simpl. (** [[ rewrite IHe1. Error: The reference IHe1 was not found in the current environment. ]] The inductive hypotheses are named [IHx1] and [IHx2] now, not [IHe1] and [IHe2]. *) Abort. (** We might decide to use a more explicit invocation of [induction] to give explicit binders for all of the names that we will reference later in the proof. *) Theorem eval_times : forall k e, eval (times k e) = k * eval e. induction e as [ | ? IHe1 ? IHe2 ]. trivial. simpl. rewrite IHe1. rewrite IHe2. rewrite mult_plus_distr_l. trivial. Qed. (** We pass [induction] an %\textit{%#<i>#intro pattern#</i>#%}%, using a [|] character to separate out instructions for the different inductive cases. Within a case, we write [?] to ask Coq to generate a name automatically, and we write an explicit name to assign that name to the corresponding new variable. It is apparent that, to use intro patterns to avoid proof brittleness, one needs to keep track of the seemingly unimportant facts of the orders in which variables are introduced. Thus, the script keeps working if we replace [e] by [x], but it has become more cluttered. Arguably, neither proof is particularly easy to follow. That category of complaint has to do with understanding proofs as static artifacts. As with programming in general, with serious projects, it tends to be much more important to be able to support evolution of proofs as specifications change. Unstructured proofs like the above examples can be very hard to update in concert with theorem statements. For instance, consider how the last proof script plays out when we modify [times] to introduce a bug. *) Reset times. Fixpoint times (k : nat) (e : exp) : exp := match e with | Const n => Const (1 + k * n) | Plus e1 e2 => Plus (times k e1) (times k e2) end. Theorem eval_times : forall k e, eval (times k e) = k * eval e. induction e as [ | ? IHe1 ? IHe2 ]. trivial. simpl. (** [[ rewrite IHe1. Error: The reference IHe1 was not found in the current environment. ]] *) Abort. (** Can you spot what went wrong, without stepping through the script step-by-step? The problem is that [trivial] never fails. Originally, [trivial] had been succeeding in proving an equality that follows by reflexivity. Our change to [times] leads to a case where that equality is no longer true. [trivial] happily leaves the false equality in place, and we continue on to the span of tactics intended for the second inductive case. Unfortunately, those tactics end up being applied to the %\textit{%#<i>#first#</i>#%}% case instead. The problem with [trivial] could be "solved" by writing [solve [trivial]] instead, so that an error is signaled early on if something unexpected happens. However, the root problem is that the syntax of a tactic invocation does not imply how many subgoals it produces. Much more confusing instances of this problem are possible. For example, if a lemma [L] is modified to take an extra hypothesis, then uses of [apply L] will general more subgoals than before. Old unstructured proof scripts will become hopelessly jumbled, with tactics applied to inappropriate subgoals. Because of the lack of structure, there is usually relatively little to be gleaned from knowledge of the precise point in a proof script where an error is raised. *) Reset times. Fixpoint times (k : nat) (e : exp) : exp := match e with | Const n => Const (k * n) | Plus e1 e2 => Plus (times k e1) (times k e2) end. (** Many real developments try to make essentially unstructured proofs look structured by applying careful indentation conventions, idempotent case-marker tactics included soley to serve as documentation, and so on. All of these strategies suffer from the same kind of failure of abstraction that was just demonstrated. I like to say that if you find yourself caring about indentation in a proof script, it is a sign that the script is structured poorly. We can rewrite the current proof with a single tactic. *) Theorem eval_times : forall k e, eval (times k e) = k * eval e. induction e as [ | ? IHe1 ? IHe2 ]; [ trivial | simpl; rewrite IHe1; rewrite IHe2; rewrite mult_plus_distr_l; trivial ]. Qed. (** This is an improvement in robustness of the script. We no longer need to worry about tactics from one case being applied to a different case. Still, the proof script is not especially readable. Probably most readers would not find it helpful in explaining why the theorem is true. The situation gets worse in considering extensions to the theorem we want to prove. Let us add multiplication nodes to our [exp] type and see how the proof fares. *) Reset exp. Inductive exp : Set := | Const : nat -> exp | Plus : exp -> exp -> exp | Mult : exp -> exp -> exp. Fixpoint eval (e : exp) : nat := match e with | Const n => n | Plus e1 e2 => eval e1 + eval e2 | Mult e1 e2 => eval e1 * eval e2 end. Fixpoint times (k : nat) (e : exp) : exp := match e with | Const n => Const (k * n) | Plus e1 e2 => Plus (times k e1) (times k e2) | Mult e1 e2 => Mult (times k e1) e2 end. Theorem eval_times : forall k e, eval (times k e) = k * eval e. (** [[ induction e as [ | ? IHe1 ? IHe2 ]; [ trivial | simpl; rewrite IHe1; rewrite IHe2; rewrite mult_plus_distr_l; trivial ]. Error: Expects a disjunctive pattern with 3 branches. ]] *) Abort. (** Unsurprisingly, the old proof fails, because it explicitly says that there are two inductive cases. To update the script, we must, at a minimum, remember the order in which the inductive cases are generated, so that we can insert the new case in the appropriate place. Even then, it will be painful to add the case, because we cannot walk through proof steps interactively when they occur inside an explicit set of cases. *) Theorem eval_times : forall k e, eval (times k e) = k * eval e. induction e as [ | ? IHe1 ? IHe2 | ? IHe1 ? IHe2 ]; [ trivial | simpl; rewrite IHe1; rewrite IHe2; rewrite mult_plus_distr_l; trivial | simpl; rewrite IHe1; rewrite mult_assoc; trivial ]. Qed. (** Now we are in a position to see how much nicer is the style of proof that we have followed in most of this book. *) Reset eval_times. Hint Rewrite mult_plus_distr_l : cpdt. Theorem eval_times : forall k e, eval (times k e) = k * eval e. induction e; crush. Qed. (** This style is motivated by a hard truth: one person's manual proof script is almost always mostly inscrutable to most everyone else. I claim that step-by-step formal proofs are a poor way of conveying information. Thus, we had might as well cut out the steps and automate as much as possible. What about the illustrative value of proofs? Most informal proofs are read to convey the big ideas of proofs. How can reading [induction e; crush] convey any big ideas? My position is that any ideas that standard automation can find are not very big after all, and the %\textit{%#<i>#real#</i>#%}% big ideas should be expressed through lemmas that are added as hints. An example should help illustrate what I mean. Consider this function, which rewrites an expression using associativity of addition and multiplication. *) Fixpoint reassoc (e : exp) : exp := match e with | Const _ => e | Plus e1 e2 => let e1' := reassoc e1 in let e2' := reassoc e2 in match e2' with | Plus e21 e22 => Plus (Plus e1' e21) e22 | _ => Plus e1' e2' end | Mult e1 e2 => let e1' := reassoc e1 in let e2' := reassoc e2 in match e2' with | Mult e21 e22 => Mult (Mult e1' e21) e22 | _ => Mult e1' e2' end end. Theorem reassoc_correct : forall e, eval (reassoc e) = eval e. induction e; crush; match goal with | [ |- context[match ?E with Const _ => _ | Plus _ _ => _ | Mult _ _ => _ end] ] => destruct E; crush end. (** One subgoal remains: [[ IHe2 : eval e3 * eval e4 = eval e2 ============================ eval e1 * eval e3 * eval e4 = eval e1 * eval e2 ]] [crush] does not know how to finish this goal. We could finish the proof manually. *) rewrite <- IHe2; crush. (** However, the proof would be easier to understand and maintain if we separated this insight into a separate lemma. *) Abort. Lemma rewr : forall a b c d, b * c = d -> a * b * c = a * d. crush. Qed. Hint Resolve rewr. Theorem reassoc_correct : forall e, eval (reassoc e) = eval e. induction e; crush; match goal with | [ |- context[match ?E with Const _ => _ | Plus _ _ => _ | Mult _ _ => _ end] ] => destruct E; crush end. Qed. (** In the limit, a complicated inductive proof might rely on one hint for each inductive case. The lemma for each hint could restate the associated case. Compared to manual proof scripts, we arrive at more readable results. Scripts no longer need to depend on the order in which cases are generated. The lemmas are easier to digest separately than are fragments of tactic code, since lemma statements include complete proof contexts. Such contexts can only be extracted from monolithic manual proofs by stepping through scripts interactively. The more common situation is that a large induction has several easy cases that automation makes short work of. In the remaining cases, automation performs some standard simplification. Among these cases, some may require quite involved proofs; such a case may deserve a hint lemma of its own, where the lemma statement may copy the simplified version of the case. Alternatively, the proof script for the main theorem may be extended with some automation code targeted at the specific case. Even such targeted scripting is more desirable than manual proving, because it may be read and understood without knowledge of a proof's hierarchical structure, case ordering, or name binding structure. *) (** * Debugging and Maintaining Automation *) (** Fully-automated proofs are desirable because they open up possibilities for automatic adaptation to changes of specification. A well-engineered script within a narrow domain can survive many changes to the formulation of the problem it solves. Still, as we are working with higher-order logic, most theorems fall within no obvious decidable theories. It is inevitable that most long-lived automated proofs will need updating. Before we are ready to update our proofs, we need to write them in the first place. While fully-automated scripts are most robust to changes of specification, it is hard to write every new proof directly in that form. Instead, it is useful to begin a theorem with exploratory proving and then gradually refine it into a suitable automated form. Consider this theorem from Chapter 7, which we begin by proving in a mostly manual way, invoking [crush] after each steop to discharge any low-hanging fruit. Our manual effort involves choosing which expressions to case-analyze on. *) (* begin hide *) Require Import MoreDep. (* end hide *) Theorem cfold_correct : forall t (e : exp t), expDenote e = expDenote (cfold e). induction e; crush. dep_destruct (cfold e1); crush. dep_destruct (cfold e2); crush. dep_destruct (cfold e1); crush. dep_destruct (cfold e2); crush. dep_destruct (cfold e1); crush. dep_destruct (cfold e2); crush. dep_destruct (cfold e1); crush. dep_destruct (expDenote e1); crush. dep_destruct (cfold e); crush. dep_destruct (cfold e); crush. Qed. (** In this complete proof, it is hard to avoid noticing a pattern. We rework the proof, abstracting over the patterns we find. *) Reset cfold_correct. Theorem cfold_correct : forall t (e : exp t), expDenote e = expDenote (cfold e). induction e; crush. (** The expression we want to destruct here turns out to be the discriminee of a [match], and we can easily enough write a tactic that destructs all such expressions. *) Ltac t := repeat (match goal with | [ |- context[match ?E with NConst _ => _ | Plus _ _ => _ | Eq _ _ => _ | BConst _ => _ | And _ _ => _ | If _ _ _ _ => _ | Pair _ _ _ _ => _ | Fst _ _ _ => _ | Snd _ _ _ => _ end] ] => dep_destruct E end; crush). t. (** This tactic invocation discharges the whole case. It does the same on the next two cases, but it gets stuck on the fourth case. *) t. t. t. (** The subgoal's conclusion is: [[ ============================ (if expDenote e1 then expDenote (cfold e2) else expDenote (cfold e3)) = expDenote (if expDenote e1 then cfold e2 else cfold e3) ]] We need to expand our [t] tactic to handle this case. *) Ltac t' := repeat (match goal with | [ |- context[match ?E with NConst _ => _ | Plus _ _ => _ | Eq _ _ => _ | BConst _ => _ | And _ _ => _ | If _ _ _ _ => _ | Pair _ _ _ _ => _ | Fst _ _ _ => _ | Snd _ _ _ => _ end] ] => dep_destruct E | [ |- (if ?E then _ else _) = _ ] => destruct E end; crush). t'. (** Now the goal is discharged, but [t'] has no effect on the next subgoal. *) t'. (** A final revision of [t] finishes the proof. *) Ltac t'' := repeat (match goal with | [ |- context[match ?E with NConst _ => _ | Plus _ _ => _ | Eq _ _ => _ | BConst _ => _ | And _ _ => _ | If _ _ _ _ => _ | Pair _ _ _ _ => _ | Fst _ _ _ => _ | Snd _ _ _ => _ end] ] => dep_destruct E | [ |- (if ?E then _ else _) = _ ] => destruct E | [ |- context[match pairOut ?E with Some _ => _ | None => _ end] ] => dep_destruct E end; crush). t''. t''. Qed. (** We can take the final tactic and move it into the initial part of the proof script, arriving at a nicely-automated proof. *) Reset t. Theorem cfold_correct : forall t (e : exp t), expDenote e = expDenote (cfold e). induction e; crush; repeat (match goal with | [ |- context[match ?E with NConst _ => _ | Plus _ _ => _ | Eq _ _ => _ | BConst _ => _ | And _ _ => _ | If _ _ _ _ => _ | Pair _ _ _ _ => _ | Fst _ _ _ => _ | Snd _ _ _ => _ end] ] => dep_destruct E | [ |- (if ?E then _ else _) = _ ] => destruct E | [ |- context[match pairOut ?E with Some _ => _ | None => _ end] ] => dep_destruct E end; crush). Qed. Section slow. Hint Resolve trans_eq. Variable A : Set. Variables P Q R S : A -> A -> Prop. Variable f : A -> A. Hypothesis H1 : forall x y, P x y -> Q x y -> R x y -> f x = f y. Hypothesis H2 : forall x y, S x y -> R x y. Lemma slow : forall x y, P x y -> Q x y -> S x y -> f x = f y. debug eauto. Qed. Hypothesis H3 : forall x y, x = y -> f x = f y. Lemma slow' : forall x y, P x y -> Q x y -> S x y -> f x = f y. debug eauto. Qed. End slow. (** * Modules *) Module Type GROUP. Parameter G : Set. Parameter f : G -> G -> G. Parameter e : G. Parameter i : G -> G. Axiom assoc : forall a b c, f (f a b) c = f a (f b c). Axiom ident : forall a, f e a = a. Axiom inverse : forall a, f (i a) a = e. End GROUP. Module Type GROUP_THEOREMS. Declare Module M : GROUP. Axiom ident' : forall a, M.f a M.e = a. Axiom inverse' : forall a, M.f a (M.i a) = M.e. Axiom unique_ident : forall e', (forall a, M.f e' a = a) -> e' = M.e. End GROUP_THEOREMS. Module Group (M : GROUP) : GROUP_THEOREMS with Module M := M. Module M := M. Import M. Theorem inverse' : forall a, f a (i a) = e. intro. rewrite <- (ident (f a (i a))). rewrite <- (inverse (f a (i a))) at 1. rewrite assoc. rewrite assoc. rewrite <- (assoc (i a) a (i a)). rewrite inverse. rewrite ident. apply inverse. Qed. Theorem ident' : forall a, f a e = a. intro. rewrite <- (inverse a). rewrite <- assoc. rewrite inverse'. apply ident. Qed. Theorem unique_ident : forall e', (forall a, M.f e' a = a) -> e' = M.e. intros. rewrite <- (H e). symmetry. apply ident'. Qed. End Group. Require Import ZArith. Open Scope Z_scope. Module Int. Definition G := Z. Definition f x y := x + y. Definition e := 0. Definition i x := -x. Theorem assoc : forall a b c, f (f a b) c = f a (f b c). unfold f; crush. Qed. Theorem ident : forall a, f e a = a. unfold f, e; crush. Qed. Theorem inverse : forall a, f (i a) a = e. unfold f, i, e; crush. Qed. End Int. Module IntTheorems := Group(Int). Check IntTheorems.unique_ident. Theorem unique_ident : forall e', (forall a, e' + a = a) -> e' = 0. exact IntTheorems.unique_ident. Qed.