(** * Smallstep: Small-step Operational Semantics *)
Require Export Imp.
(** The evaluators we have seen so far (e.g., the ones for
[aexp]s, [bexp]s, and commands) have been formulated in a
"big-step" style -- they specify how a given expression can be
evaluated to its final value (or a command plus a store to a final
store) "all in one big step."
This style is simple and natural for many purposes -- indeed,
Gilles Kahn, who popularized its use, called it _natural
semantics_. But there are some things it does not do well. In
particular, it does not give us a natural way of talking about
_concurrent_ programming languages, where the "semantics" of a
program -- i.e., the essence of how it behaves -- is not just
which input states get mapped to which output states, but also
includes the intermediate states that it passes through along the
way, since these states can also be observed by concurrently
executing code.
Another shortcoming of the big-step style is more technical, but
critical in some situations. To see the issue, suppose we wanted
to define a variant of Imp where variables could hold _either_
numbers _or_ lists of numbers (see the [HoareList] chapter for
details). In the syntax of this extended language, it will be
possible to write strange expressions like [2 + nil], and our
semantics for arithmetic expressions will then need to say
something about how such expressions behave. One
possibility (explored in the [HoareList] chapter) is to maintain
the convention that every arithmetic expressions evaluates to some
number by choosing some way of viewing a list as a number -- e.g.,
by specifying that a list should be interpreted as [0] when it
occurs in a context expecting a number. But this is really a bit
of a hack.
A much more natural approach is simply to say that the behavior of
an expression like [2+nil] is _undefined_ -- it doesn't evaluate
to any result at all. And we can easily do this: we just have to
formulate [aeval] and [beval] as [Inductive] propositions rather
than Fixpoints, so that we can make them partial functions instead
of total ones.
However, now we encounter a serious deficiency. In this language,
a command might _fail_ to map a given starting state to any ending
state for two quite different reasons: either because the
execution gets into an infinite loop or because, at some point,
the program tries to do an operation that makes no sense, such as
adding a number to a list, and none of the evaluation rules can be
applied.
These two outcomes -- nontermination vs. getting stuck in an
erroneous configuration -- are quite different. In particular, we
want to allow the first (permitting the possibility of infinite
loops is the price we pay for the convenience of programming with
general looping constructs like [while]) but prevent the
second (which is just wrong), for example by adding some form of
_typechecking_ to the language. Indeed, this will be a major
topic for the rest of the course. As a first step, we need a
different way of presenting the semantics that allows us to
distinguish nontermination from erroneous "stuck states."
So, for lots of reasons, we'd like to have a finer-grained way of
defining and reasoning about program behaviors. This is the topic
of the present chapter. We replace the "big-step" [eval] relation
with a "small-step" relation that specifies, for a given program,
how the "atomic steps" of computation are performed. *)
(* ########################################################### *)
(** * A Toy Language *)
(** To save space in the discussion, let's go back to an
incredibly simple language containing just constants and
addition. (We use single letters -- [C] and [P] -- for the
constructor names, for brevity.) At the end of the chapter, we'll
see how to apply the same techniques to the full Imp language. *)
Inductive tm : Type :=
| C : nat -> tm (* Constant *)
| P : tm -> tm -> tm. (* Plus *)
Tactic Notation "tm_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "C" | Case_aux c "P" ].
(** Here is a standard evaluator for this language, written in the
same (big-step) style as we've been using up to this point. *)
Fixpoint evalF (t : tm) : nat :=
match t with
| C n => n
| P a1 a2 => evalF a1 + evalF a2
end.
(** Now, here is the same evaluator, written in exactly the same
style, but formulated as an inductively defined relation. Again,
we use the notation [t || n] for "[t] evaluates to [n]." *)
(**
-------- (E_Const)
C n || n
t1 || n1
t2 || n2
---------------------- (E_Plus)
P t1 t2 || C (n1 + n2)
*)
Reserved Notation " t '||' n " (at level 50, left associativity).
Inductive eval : tm -> nat -> Prop :=
| E_Const : forall n,
C n || n
| E_Plus : forall t1 t2 n1 n2,
t1 || n1 ->
t2 || n2 ->
P t1 t2 || (n1 + n2)
where " t '||' n " := (eval t n).
Tactic Notation "eval_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "E_Const" | Case_aux c "E_Plus" ].
Module SimpleArith1.
(** Now, here is a small-step version. *)
(**
------------------------------- (ST_PlusConstConst)
P (C n1) (C n2) ==> C (n1 + n2)
t1 ==> t1'
-------------------- (ST_Plus1)
P t1 t2 ==> P t1' t2
t2 ==> t2'
--------------------------- (ST_Plus2)
P (C n1) t2 ==> P (C n1) t2'
*)
Reserved Notation " t '==>' t' " (at level 40).
Inductive step : tm -> tm -> Prop :=
| ST_PlusConstConst : forall n1 n2,
P (C n1) (C n2) ==> C (n1 + n2)
| ST_Plus1 : forall t1 t1' t2,
t1 ==> t1' ->
P t1 t2 ==> P t1' t2
| ST_Plus2 : forall n1 t2 t2',
t2 ==> t2' ->
P (C n1) t2 ==> P (C n1) t2'
where " t '==>' t' " := (step t t').
Tactic Notation "step_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "ST_PlusConstConst"
| Case_aux c "ST_Plus1" | Case_aux c "ST_Plus2" ].
(** Things to notice:
- We are defining just a single reduction step, in which
one [P] node is replaced by its value.
- Each step finds the _leftmost_ [P] node that is ready to
go (both of its operands are constants) and rewrites it in
place. The first rule tells how to rewrite this [P] node
itself; the other two rules tell how to find it.
- A term that is just a constant cannot take a step. *)
(** Let's pause and check a couple of examples of reasoning with
the [step] relation... *)
(** If [t1] can take a step to [t1'], then [P t1 t2] steps
to [P t1' t2]: *)
Example test_step_1 :
P
(P (C 0) (C 3))
(P (C 2) (C 4))
==>
P
(C (0 + 3))
(P (C 2) (C 4)).
Proof.
apply ST_Plus1. apply ST_PlusConstConst. Qed.
(** **** Exercise: 1 star (test_step_2) *)
(** Right-hand sides of sums can take a step only when the
left-hand side is finished: if [t2] can take a step to [t2'],
then [P (C n) t2] steps to [P (C n)
t2']: *)
Example test_step_2 :
P
(C 0)
(P
(C 2)
(P (C 0) (C 3)))
==>
P
(C 0)
(P
(C 2)
(C (0 + 3))).
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(* ########################################################### *)
(** * Relations *)
(** We will be using several different step relations, so it is
helpful to generalize a bit... *)
(** A (binary) _relation_ on a set [X] is a family of propositions
parameterized by two elements of [X] -- i.e., a proposition about
pairs of elements of [X]. *)
Definition relation (X: Type) := X->X->Prop.
(** Our main examples of such relations in this chapter will be
the single-step and multi-step reduction relations on terms, [==>]
and [==>*], but there are many other examples -- some that come to
mind are the "equals," "less than," "less than or equal to," and
"is the square of" relations on numbers, and the "prefix of"
relation on lists and strings. *)
(** One simple property of the [==>] relation is that, like the
evaluation relation for our language of Imp programs, it is
_deterministic_.
_Theorem_: For each [t], there is at most one [t'] such that [t]
steps to [t'] ([t ==> t'] is provable). Formally, this is the
same as saying that [==>] is deterministic. *)
(** _Proof sketch_: We show that if [x] steps to both [y1] and [y2]
then [y1] and [y2] are equal, by induction on a derivation of
[step x y1]. There are several cases to consider, depending on
the last rule used in this derivation and in the given derivation
of [step x y2].
- If both are [ST_PlusConstConst], the result is immediate.
- The cases when both derivations end with [ST_Plus1] or
[ST_Plus2] follow by the induction hypothesis.
- It cannot happen that one is [ST_PlusConstConst] and the other
is [ST_Plus1] or [ST_Plus2], since this would imply that [x] has
the form [P t1 t2] where both [t1] and [t2] are
constants (by [ST_PlusConstConst]) _and_ one of [t1] or [t2] has
the form [P ...].
- Similarly, it cannot happen that one is [ST_Plus1] and the other
is [ST_Plus2], since this would imply that [x] has the form
[P t1 t2] where [t1] has both the form [P t1 t2] and
the form [C n]. [] *)
Definition deterministic {X: Type} (R: relation X) :=
forall x y1 y2 : X, R x y1 -> R x y2 -> y1 = y2.
Theorem step_deterministic:
deterministic step.
Proof.
unfold deterministic. intros x y1 y2 Hy1 Hy2.
generalize dependent y2.
step_cases (induction Hy1) Case; intros y2 Hy2.
Case "ST_PlusConstConst". step_cases (inversion Hy2) SCase.
SCase "ST_PlusConstConst". reflexivity.
SCase "ST_Plus1". inversion H2.
SCase "ST_Plus2". inversion H2.
Case "ST_Plus1". step_cases (inversion Hy2) SCase.
SCase "ST_PlusConstConst". rewrite <- H0 in Hy1. inversion Hy1.
SCase "ST_Plus1".
rewrite <- (IHHy1 t1'0).
reflexivity. assumption.
SCase "ST_Plus2". rewrite <- H in Hy1. inversion Hy1.
Case "ST_Plus2". step_cases (inversion Hy2) SCase.
SCase "ST_PlusConstConst". rewrite <- H1 in Hy1. inversion Hy1.
SCase "ST_Plus1". inversion H2.
SCase "ST_Plus2".
rewrite <- (IHHy1 t2'0).
reflexivity. assumption. Qed.
End SimpleArith1.
(* ########################################################### *)
(** ** Values *)
(** Let's take a moment to slightly generalize the way we state the
definition of single-step reduction. *)
(** It is useful to think of the [==>] relation as defining an
_abstract machine_:
- At any moment, the _state_ of the machine is a term.
- A _step_ of the machine is an atomic unit of computation --
here, a single "add" operation.
- The _halting states_ of the machine are ones where there is no
more computation to be done.
*)
(**
We can then execute a term [t] as follows:
- Take [t] as the starting state of the machine.
- Repeatedly use the [==>] relation to find a sequence of
machine states, starting with [t], where each state steps to
the next.
- When no more reduction is possible, "read out" the final state
of the machine as the result of execution. *)
(** Intuitively, it is clear that the final states of the
machine are always terms of the form [C n] for some [n].
We call such terms _values_. *)
Inductive value : tm -> Prop :=
v_const : forall n, value (C n).
(** Having introduced the idea of values, we can use it in the
definition of the [==>] relation to write [ST_Plus2] rule in a
slightly more elegant way: *)
(**
------------------------------- (ST_PlusConstConst)
P (C n1) (C n2) ==> C (n1 + n2)
t1 ==> t1'
-------------------- (ST_Plus1)
P t1 t2 ==> P t1' t2
value v1
t2 ==> t2'
-------------------- (ST_Plus2)
P v1 t2 ==> P v1 t2'
*)
(** Again, the variable names here carry important information:
by convention, [v1] ranges only over values, while [t1] and [t2]
range over arbitrary terms. (Given this convention, the explicit
[value] hypothesis is arguably redundant. We'll keep it for now,
to maintain a close correspondence between the informal and Coq
versions of the rules, but later on we'll drop it in informal
rules, for the sake of brevity.) *)
(** Here are the formal rules: *)
Reserved Notation " t '==>' t' " (at level 40).
Inductive step : tm -> tm -> Prop :=
| ST_PlusConstConst : forall n1 n2,
P (C n1) (C n2)
==> C (n1 + n2)
| ST_Plus1 : forall t1 t1' t2,
t1 ==> t1' ->
P t1 t2 ==> P t1' t2
| ST_Plus2 : forall v1 t2 t2',
value v1 -> (* <----- n.b. *)
t2 ==> t2' ->
P v1 t2 ==> P v1 t2'
where " t '==>' t' " := (step t t').
Tactic Notation "step_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "ST_PlusConstConst"
| Case_aux c "ST_Plus1" | Case_aux c "ST_Plus2" ].
(** **** Exercise: 3 stars (redo_determinism) *)
(** As a sanity check on this change, let's re-verify determinism
Proof sketch: We must show that if [x] steps to both [y1] and [y2]
then [y1] and [y2] are equal. Consider the final rules used in
the derivations of [step x y1] and [step x y2].
- If both are [ST_PlusConstConst], the result is immediate.
- It cannot happen that one is [ST_PlusConstConst] and the other
is [ST_Plus1] or [ST_Plus2], since this would imply that [x] has
the form [P t1 t2] where both [t1] and [t2] are
constants (by [ST_PlusConstConst]) AND one of [t1] or [t2] has
the form [P ...].
- Similarly, it cannot happen that one is [ST_Plus1] and the other
is [ST_Plus2], since this would imply that [x] has the form
[P t1 t2] where [t1] both has the form [P t1 t2] and
is a value (hence has the form [C n]).
- The cases when both derivations end with [ST_Plus1] or
[ST_Plus2] follow by the induction hypothesis. [] *)
(** Most of this proof is the same as the one above. But to get
maximum benefit from the exercise you should try to write it from
scratch and just use the earlier one if you get stuck. *)
Theorem step_deterministic :
deterministic step.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(* ########################################################### *)
(** ** Strong Progress and Normal Forms *)
(** The definition of single-step reduction for our toy language is
fairly simple, but for a larger language it would be pretty easy
to forget one of the rules and create a situation where some term
cannot take a step even though it has not been completely reduced
to a value. The following theorem shows that we did not, in fact,
make such a mistake here. *)
(** _Theorem_ (_Strong Progress_): If [t] is a term, then either [t]
is a value, or there exists a term [t'] such that [t ==> t']. *)
(** _Proof_: By induction on [t].
- Suppose [t = C n]. Then [t] is a [value].
- Suppose [t = P t1 t2], where (by the IH) [t1] is either a
value or can step to some [t1'], and where [t2] is either a
value or can step to some [t2']. We must show [P t1 t2] is
either a value or steps to some [t'].
- If [t1] and [t2] are both values, then [t] can take a step, by
[ST_PlusConstConst].
- If [t1] is a value and [t2] can take a step, then so can [t],
by [ST_Plus2].
- If [t1] can take a step, then so can [t], by [ST_Plus1]. [] *)
Theorem strong_progress : forall t,
value t \/ (exists t', t ==> t').
Proof.
tm_cases (induction t) Case.
Case "C". left. apply v_const.
Case "P". right. inversion IHt1.
SCase "l". inversion IHt2.
SSCase "l". inversion H. inversion H0.
exists (C (n + n0)).
apply ST_PlusConstConst.
SSCase "r". inversion H0 as [t' H1].
exists (P t1 t').
apply ST_Plus2. apply H. apply H1.
SCase "r". inversion H as [t' H0].
exists (P t' t2).
apply ST_Plus1. apply H0. Qed.
(** This important property is called _strong progress_, because
every term either is a value or can "make progress" by stepping to
some other term. (The qualifier "strong" distinguishes it from a
more refined version that we'll see in later chapters, called
simply "progress.") *)
(** The idea of "making progress" can be extended to tell us something
interesting about [value]s: in this language [value]s are exactly
the terms that _cannot_ make progress in this sense.
To state this observation formally, let's begin by giving a name
to terms that cannot make progress. We'll call them _normal
forms_. *)
Definition normal_form {X:Type} (R:relation X) (t:X) : Prop :=
~ exists t', R t t'.
(** This definition actually specifies what it is to be a normal form
for an _arbitrary_ relation [R] over an arbitrary set [X], not
just for the particular single-step reduction relation over terms
that we are interested in at the moment. We'll re-use the same
terminology for talking about other relations later in the
course. *)
(** We can use this terminology to generalize the observation we made
in the strong progress theorem: in this language, normal forms and
values are actually the same thing. *)
Lemma value_is_nf : forall v,
value v -> normal_form step v.
Proof.
unfold normal_form. intros v H. inversion H.
intros contra. inversion contra. inversion H1.
Qed.
Lemma nf_is_value : forall t,
normal_form step t -> value t.
Proof. (* a corollary of [strong_progress]... *)
unfold normal_form. intros t H.
assert (G : value t \/ exists t', t ==> t').
SCase "Proof of assertion". apply strong_progress.
inversion G.
SCase "l". apply H0.
SCase "r". apply ex_falso_quodlibet. apply H. assumption. Qed.
Corollary nf_same_as_value : forall t,
normal_form step t <-> value t.
Proof.
split. apply nf_is_value. apply value_is_nf. Qed.
(** Why is this interesting?
Because [value] is a syntactic concept -- it is defined by looking
at the form of a term -- while [normal_form] is a semantic one --
it is defined by looking at how the term steps. It is not obvious
that these concepts should coincide!
Indeed, we could easily have written the definitions so that they
would not coincide... *)
(* ##################################################### *)
(** We might, for example, mistakenly define [value] so that it
includes some terms that are not finished reducing. *)
Module Temp1.
(* Open an inner module so we can redefine value and step. *)
Inductive value : tm -> Prop :=
| v_const : forall n, value (C n)
| v_funny : forall t1 n2, (* <---- *)
value (P t1 (C n2)).
Reserved Notation " t '==>' t' " (at level 40).
Inductive step : tm -> tm -> Prop :=
| ST_PlusConstConst : forall n1 n2,
P (C n1) (C n2) ==> C (n1 + n2)
| ST_Plus1 : forall t1 t1' t2,
t1 ==> t1' ->
P t1 t2 ==> P t1' t2
| ST_Plus2 : forall v1 t2 t2',
value v1 ->
t2 ==> t2' ->
P v1 t2 ==> P v1 t2'
where " t '==>' t' " := (step t t').
(** **** Exercise: 3 stars, advanced (value_not_same_as_normal_form) *)
Lemma value_not_same_as_normal_form :
exists v, value v /\ ~ normal_form step v.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
End Temp1.
(* ##################################################### *)
(** Alternatively, we might mistakenly define [step] so that it
permits something designated as a value to reduce further. *)
Module Temp2.
Inductive value : tm -> Prop :=
| v_const : forall n, value (C n).
Reserved Notation " t '==>' t' " (at level 40).
Inductive step : tm -> tm -> Prop :=
| ST_Funny : forall n, (* <---- *)
C n ==> P (C n) (C 0)
| ST_PlusConstConst : forall n1 n2,
P (C n1) (C n2) ==> C (n1 + n2)
| ST_Plus1 : forall t1 t1' t2,
t1 ==> t1' ->
P t1 t2 ==> P t1' t2
| ST_Plus2 : forall v1 t2 t2',
value v1 ->
t2 ==> t2' ->
P v1 t2 ==> P v1 t2'
where " t '==>' t' " := (step t t').
(** **** Exercise: 2 stars, advanced (value_not_same_as_normal_form) *)
Lemma value_not_same_as_normal_form :
exists v, value v /\ ~ normal_form step v.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
End Temp2.
(* ########################################################### *)
(** Finally, we might define [value] and [step] so that there is some
term that is not a value but that cannot take a step in the [step]
relation. Such terms are said to be _stuck_. In this case this is
caused by a mistake in the semantics, but we will also see
situations where, even in a correct language definition, it makes
sense to allow some terms to be stuck. *)
Module Temp3.
Inductive value : tm -> Prop :=
| v_const : forall n, value (C n).
Reserved Notation " t '==>' t' " (at level 40).
Inductive step : tm -> tm -> Prop :=
| ST_PlusConstConst : forall n1 n2,
P (C n1) (C n2) ==> C (n1 + n2)
| ST_Plus1 : forall t1 t1' t2,
t1 ==> t1' ->
P t1 t2 ==> P t1' t2
where " t '==>' t' " := (step t t').
(** (Note that [ST_Plus2] is missing.) *)
(** **** Exercise: 3 stars, advanced (value_not_same_as_normal_form') *)
Lemma value_not_same_as_normal_form :
exists t, ~ value t /\ normal_form step t.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
End Temp3.
(* ########################################################### *)
(** *** Additional Exercises *)
Module Temp4.
(** Here is another very simple language whose terms, instead of being
just plus and numbers, are just the booleans true and false and a
conditional expression... *)
Inductive tm : Type :=
| ttrue : tm
| tfalse : tm
| tif : tm -> tm -> tm -> tm.
Inductive value : tm -> Prop :=
| v_true : value ttrue
| v_false : value tfalse.
Reserved Notation " t '==>' t' " (at level 40).
Inductive step : tm -> tm -> Prop :=
| ST_IfTrue : forall t1 t2,
tif ttrue t1 t2 ==> t1
| ST_IfFalse : forall t1 t2,
tif tfalse t1 t2 ==> t2
| ST_If : forall t1 t1' t2 t3,
t1 ==> t1' ->
tif t1 t2 t3 ==> tif t1' t2 t3
where " t '==>' t' " := (step t t').
(** **** Exercise: 1 star (smallstep_bools) *)
(** Which of the following propositions are provable? (This is just a
thought exercise, but for an extra challenge feel free to prove
your answers in Coq.) *)
Definition bool_step_prop1 :=
tfalse ==> tfalse.
(* FILL IN HERE *)
Definition bool_step_prop2 :=
tif
ttrue
(tif ttrue ttrue ttrue)
(tif tfalse tfalse tfalse)
==>
ttrue.
(* FILL IN HERE *)
Definition bool_step_prop3 :=
tif
(tif ttrue ttrue ttrue)
(tif ttrue ttrue ttrue)
tfalse
==>
tif
ttrue
(tif ttrue ttrue ttrue)
tfalse.
(* FILL IN HERE *)
(** [] *)
(** **** Exercise: 3 stars, optional (progress_bool) *)
(** Just as we proved a progress theorem for plus expressions, we can
do so for boolean expressions, as well. *)
Theorem strong_progress : forall t,
value t \/ (exists t', t ==> t').
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** **** Exercise: 2 stars, optional (step_deterministic) *)
Theorem step_deterministic :
deterministic step.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
Module Temp5.
(** **** Exercise: 2 stars (smallstep_bool_shortcut) *)
(** Suppose we want to add a "short circuit" to the step relation for
boolean expressions, so that it can recognize when the [then] and
[else] branches of a conditional are the same value (either
[ttrue] or [tfalse]) and reduce the whole conditional to this
value in a single step, even if the guard has not yet been reduced
to a value. For example, we would like this proposition to be
provable:
tif
(tif ttrue ttrue ttrue)
tfalse
tfalse
==>
tfalse.
*)
(** Write an extra clause for the step relation that achieves this
effect and prove [bool_step_prop4]. *)
Reserved Notation " t '==>' t' " (at level 40).
Inductive step : tm -> tm -> Prop :=
| ST_IfTrue : forall t1 t2,
tif ttrue t1 t2 ==> t1
| ST_IfFalse : forall t1 t2,
tif tfalse t1 t2 ==> t2
| ST_If : forall t1 t1' t2 t3,
t1 ==> t1' ->
tif t1 t2 t3 ==> tif t1' t2 t3
(* FILL IN HERE *)
where " t '==>' t' " := (step t t').
(** [] *)
Definition bool_step_prop4 :=
tif
(tif ttrue ttrue ttrue)
tfalse
tfalse
==>
tfalse.
Example bool_step_prop4_holds :
bool_step_prop4.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** **** Exercise: 3 stars, optional (properties_of_altered_step) *)
(** It can be shown that the determinism and strong progress theorems
for the step relation in the lecture notes also hold for the
definition of step given above. After we add the clause
[ST_ShortCircuit]...
- Is the [step] relation still deterministic? Write yes or no and
briefly (1 sentence) explain your answer.
Optional: prove your answer correct in Coq.
*)
(* FILL IN HERE *)
(**
- Does a strong progress theorem hold? Write yes or no and
briefly (1 sentence) explain your answer.
Optional: prove your answer correct in Coq.
*)
(* FILL IN HERE *)
(**
- In general, is there any way we could cause strong progress to
fail if we took away one or more constructors from the original
step relation? Write yes or no and briefly (1 sentence) explain
your answer.
(* FILL IN HERE *)
*)
(** [] *)
End Temp5.
End Temp4.
(* ########################################################### *)
(** * Multi-Step Reduction *)
(** Until now, we've been working with the _single-step reduction_
relation [==>], which formalizes the individual steps of an
_abstract machine_ for executing programs.
We can also use this machine to reduce programs to completion --
to find out what final result they yield. This can be formalized
as follows:
- First, we define a _multi-step reduction relation_ [==>*], which
relates terms [t] and [t'] if [t] can reach [t'] by any number
of single reduction steps (including zero steps!).
- Then we define a "result" of a term [t] as a normal form that
[t] can reach by multi-step reduction. *)
(* ########################################################### *)
(** Since we'll want to reuse the idea of multi-step reduction many
times in this and future chapters, let's take a little extra
trouble here and define it generically.
Given a relation [R], we define a relation [multi R], called the
_multi-step closure of [R]_ as follows: *)
Inductive multi {X:Type} (R: relation X) : relation X :=
| multi_refl : forall (x : X), multi R x x
| multi_step : forall (x y z : X),
R x y ->
multi R y z ->
multi R x z.
(** The effect of this definition is that [multi R] relates two
elements [x] and [y] if either
- [x = y], or else
- there is some sequence [z1], [z2], ..., [zn]
such that
R x z1
R z1 z2
...
R zn y.
Thus, if [R] describes a single-step of computation, [z1],
... [zn] is the sequence of intermediate steps of computation
between [x] and [y].
*)
Tactic Notation "multi_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "multi_refl" | Case_aux c "multi_step" ].
(** We write [==>*] for the [multi step] relation -- i.e., the
relation that relates two terms [t] and [t'] if we can get from
[t] to [t'] using the [step] relation zero or more times. *)
Definition multistep := multi step.
Notation " t '==>*' t' " := (multistep t t') (at level 40).
(** The relation [multi R] has several crucial properties.
First, it is obviously _reflexive_ (that is, [forall x, multi R x
x]). In the case of the [==>*] (i.e. [multi step]) relation, the
intuition is that a term can execute to itself by taking zero
steps of execution.
Second, it contains [R] -- that is, single-step executions are a
particular case of multi-step executions. (It is this fact that
justifies the word "closure" in the term "multi-step closure of
[R].") *)
Theorem multi_R : forall (X:Type) (R:relation X) (x y : X),
R x y -> (multi R) x y.
Proof.
intros X R x y H.
apply multi_step with y. apply H. apply multi_refl. Qed.
(** Third, [multi R] is _transitive_. *)
Theorem multi_trans :
forall (X:Type) (R: relation X) (x y z : X),
multi R x y ->
multi R y z ->
multi R x z.
Proof.
intros X R x y z G H.
multi_cases (induction G) Case.
Case "multi_refl". assumption.
Case "multi_step".
apply multi_step with y. assumption.
apply IHG. assumption. Qed.
(** That is, if [t1==>*t2] and [t2==>*t3], then [t1==>*t3]. *)
(* ########################################################### *)
(** ** Examples *)
Lemma test_multistep_1:
P
(P (C 0) (C 3))
(P (C 2) (C 4))
==>*
C ((0 + 3) + (2 + 4)).
Proof.
apply multi_step with
(P
(C (0 + 3))
(P (C 2) (C 4))).
apply ST_Plus1. apply ST_PlusConstConst.
apply multi_step with
(P
(C (0 + 3))
(C (2 + 4))).
apply ST_Plus2. apply v_const.
apply ST_PlusConstConst.
apply multi_R.
apply ST_PlusConstConst. Qed.
(** Here's an alternate proof that uses [eapply] to avoid explicitly
constructing all the intermediate terms. *)
Lemma test_multistep_1':
P
(P (C 0) (C 3))
(P (C 2) (C 4))
==>*
C ((0 + 3) + (2 + 4)).
Proof.
eapply multi_step. apply ST_Plus1. apply ST_PlusConstConst.
eapply multi_step. apply ST_Plus2. apply v_const.
apply ST_PlusConstConst.
eapply multi_step. apply ST_PlusConstConst.
apply multi_refl. Qed.
(** **** Exercise: 1 star, optional (test_multistep_2) *)
Lemma test_multistep_2:
C 3 ==>* C 3.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** **** Exercise: 1 star, optional (test_multistep_3) *)
Lemma test_multistep_3:
P (C 0) (C 3)
==>*
P (C 0) (C 3).
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** **** Exercise: 2 stars (test_multistep_4) *)
Lemma test_multistep_4:
P
(C 0)
(P
(C 2)
(P (C 0) (C 3)))
==>*
P
(C 0)
(C (2 + (0 + 3))).
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(* ########################################################### *)
(** ** Normal Forms Again *)
(** If [t] reduces to [t'] in zero or more steps and [t'] is a
normal form, we say that "[t'] is a normal form of [t]." *)
Definition step_normal_form := normal_form step.
Definition normal_form_of (t t' : tm) :=
(t ==>* t' /\ step_normal_form t').
(** We have already seen that, for our language, single-step reduction is
deterministic -- i.e., a given term can take a single step in
at most one way. It follows from this that, if [t] can reach
a normal form, then this normal form is unique. In other words, we
can actually pronounce [normal_form t t'] as "[t'] is _the_
normal form of [t]." *)
(** **** Exercise: 3 stars, optional (normal_forms_unique) *)
Theorem normal_forms_unique:
deterministic normal_form_of.
Proof.
unfold deterministic. unfold normal_form_of. intros x y1 y2 P1 P2.
inversion P1 as [P11 P12]; clear P1. inversion P2 as [P21 P22]; clear P2.
generalize dependent y2.
(* We recommend using this initial setup as-is! *)
(* FILL IN HERE *) Admitted.
(** [] *)
(** Indeed, something stronger is true for this language (though not
for all languages): the reduction of _any_ term [t] will
eventually reach a normal form -- i.e., [normal_form_of] is a
_total_ function. Formally, we say the [step] relation is
_normalizing_. *)
Definition normalizing {X:Type} (R:relation X) :=
forall t, exists t',
(multi R) t t' /\ normal_form R t'.
(** To prove that [step] is normalizing, we need a couple of lemmas.
First, we observe that, if [t] reduces to [t'] in many steps, then
the same sequence of reduction steps within [t] is also possible
when [t] appears as the left-hand child of a [P] node, and
similarly when [t] appears as the right-hand child of a [P]
node whose left-hand child is a value. *)
Lemma multistep_congr_1 : forall t1 t1' t2,
t1 ==>* t1' ->
P t1 t2 ==>* P t1' t2.
Proof.
intros t1 t1' t2 H. multi_cases (induction H) Case.
Case "multi_refl". apply multi_refl.
Case "multi_step". apply multi_step with (P y t2).
apply ST_Plus1. apply H.
apply IHmulti. Qed.
(** **** Exercise: 2 stars (multistep_congr_2) *)
Lemma multistep_congr_2 : forall t1 t2 t2',
value t1 ->
t2 ==>* t2' ->
P t1 t2 ==>* P t1 t2'.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** _Theorem_: The [step] function is normalizing -- i.e., for every
[t] there exists some [t'] such that [t] steps to [t'] and [t'] is
a normal form.
_Proof sketch_: By induction on terms. There are two cases to
consider:
- [t = C n] for some [n]. Here [t] doesn't take a step,
and we have [t' = t]. We can derive the left-hand side by
reflexivity and the right-hand side by observing (a) that values
are normal forms (by [nf_same_as_value]) and (b) that [t] is a
value (by [v_const]).
- [t = P t1 t2] for some [t1] and [t2]. By the IH, [t1] and
[t2] have normal forms [t1'] and [t2']. Recall that normal
forms are values (by [nf_same_as_value]); we know that [t1' =
C n1] and [t2' = C n2], for some [n1] and [n2].
We can combine the [==>*] derivations for [t1] and [t2] to prove
that [P t1 t2] reduces in many steps to [C (n1 + n2)].
It is clear that our choice of [t' = C (n1 + n2)] is a
value, which is in turn a normal form. [] *)
Theorem step_normalizing :
normalizing step.
Proof.
unfold normalizing.
tm_cases (induction t) Case.
Case "C".
exists (C n).
split.
SCase "l". apply multi_refl.
SCase "r".
(* We can use [rewrite] with "iff" statements, not
just equalities: *)
rewrite nf_same_as_value. apply v_const.
Case "P".
inversion IHt1 as [t1' H1]; clear IHt1. inversion IHt2 as [t2' H2]; clear IHt2.
inversion H1 as [H11 H12]; clear H1. inversion H2 as [H21 H22]; clear H2.
rewrite nf_same_as_value in H12. rewrite nf_same_as_value in H22.
inversion H12 as [n1]. inversion H22 as [n2].
rewrite <- H in H11.
rewrite <- H0 in H21.
exists (C (n1 + n2)).
split.
SCase "l".
apply multi_trans with (P (C n1) t2).
apply multistep_congr_1. apply H11.
apply multi_trans with
(P (C n1) (C n2)).
apply multistep_congr_2. apply v_const. apply H21.
apply multi_R. apply ST_PlusConstConst.
SCase "r".
rewrite nf_same_as_value. apply v_const. Qed.
(* ########################################################### *)
(** ** Equivalence of Big-Step and Small-Step Reduction *)
(** Having defined the operational semantics of our tiny programming
language in two different styles, it makes sense to ask whether
these definitions actually define the same thing! They do, though
it takes a little work to show it. (The details are left as an
exercise). *)
(** **** Exercise: 3 stars (eval__multistep) *)
Theorem eval__multistep : forall t n,
t || n -> t ==>* C n.
(** The key idea behind the proof comes from the following picture:
P t1 t2 ==> (by ST_Plus1)
P t1' t2 ==> (by ST_Plus1)
P t1'' t2 ==> (by ST_Plus1)
...
P (C n1) t2 ==> (by ST_Plus2)
P (C n1) t2' ==> (by ST_Plus2)
P (C n1) t2'' ==> (by ST_Plus2)
...
P (C n1) (C n2) ==> (by ST_PlusConstConst)
C (n1 + n2)
That is, the multistep reduction of a term of the form [P t1 t2]
proceeds in three phases:
- First, we use [ST_Plus1] some number of times to reduce [t1]
to a normal form, which must (by [nf_same_as_value]) be a
term of the form [C n1] for some [n1].
- Next, we use [ST_Plus2] some number of times to reduce [t2]
to a normal form, which must again be a term of the form [C
n2] for some [n2].
- Finally, we use [ST_PlusConstConst] one time to reduce [P (C
n1) (C n2)] to [C (n1 + n2)]. *)
(** To formalize this intuition, you'll need to use the congruence
lemmas from above (you might want to review them now, so that
you'll be able to recognize when they are useful), plus some basic
properties of [==>*]: that it is reflexive, transitive, and
includes [==>]. *)
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** **** Exercise: 3 stars, advanced (eval__multistep_inf) *)
(** Write a detailed informal version of the proof of [eval__multistep].
(* FILL IN HERE *)
[]
*)
(** For the other direction, we need one lemma, which establishes a
relation between single-step reduction and big-step evaluation. *)
(** **** Exercise: 3 stars (step__eval) *)
Lemma step__eval : forall t t' n,
t ==> t' ->
t' || n ->
t || n.
Proof.
intros t t' n Hs. generalize dependent n.
(* FILL IN HERE *) Admitted.
(** [] *)
(** The fact that small-step reduction implies big-step is now
straightforward to prove, once it is stated correctly.
The proof proceeds by induction on the multi-step reduction
sequence that is buried in the hypothesis [normal_form_of t t']. *)
(** Make sure you understand the statement before you start to
work on the proof. *)
(** **** Exercise: 3 stars (multistep__eval) *)
Theorem multistep__eval : forall t t',
normal_form_of t t' -> exists n, t' = C n /\ t || n.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(* ########################################################### *)
(** ** Additional Exercises *)
(** **** Exercise: 3 stars, optional (interp_tm) *)
(** Remember that we also defined big-step evaluation of [tm]s as a
function [evalF]. Prove that it is equivalent to the existing
semantics.
Hint: we just proved that [eval] and [multistep] are
equivalent, so logically it doesn't matter which you choose.
One will be easier than the other, though! *)
Theorem evalF_eval : forall t n,
evalF t = n <-> t || n.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** **** Exercise: 4 stars (combined_properties) *)
(** We've considered the arithmetic and conditional expressions
separately. This exercise explores how the two interact. *)
Module Combined.
Inductive tm : Type :=
| C : nat -> tm
| P : tm -> tm -> tm
| ttrue : tm
| tfalse : tm
| tif : tm -> tm -> tm -> tm.
Tactic Notation "tm_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "C" | Case_aux c "P"
| Case_aux c "ttrue" | Case_aux c "tfalse" | Case_aux c "tif" ].
Inductive value : tm -> Prop :=
| v_const : forall n, value (C n)
| v_true : value ttrue
| v_false : value tfalse.
Reserved Notation " t '==>' t' " (at level 40).
Inductive step : tm -> tm -> Prop :=
| ST_PlusConstConst : forall n1 n2,
P (C n1) (C n2) ==> C (n1 + n2)
| ST_Plus1 : forall t1 t1' t2,
t1 ==> t1' ->
P t1 t2 ==> P t1' t2
| ST_Plus2 : forall v1 t2 t2',
value v1 ->
t2 ==> t2' ->
P v1 t2 ==> P v1 t2'
| ST_IfTrue : forall t1 t2,
tif ttrue t1 t2 ==> t1
| ST_IfFalse : forall t1 t2,
tif tfalse t1 t2 ==> t2
| ST_If : forall t1 t1' t2 t3,
t1 ==> t1' ->
tif t1 t2 t3 ==> tif t1' t2 t3
where " t '==>' t' " := (step t t').
Tactic Notation "step_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "ST_PlusConstConst"
| Case_aux c "ST_Plus1" | Case_aux c "ST_Plus2"
| Case_aux c "ST_IfTrue" | Case_aux c "ST_IfFalse" | Case_aux c "ST_If" ].
(** Earlier, we separately proved for both plus- and if-expressions...
- that the step relation was deterministic, and
- a strong progress lemma, stating that every term is either a
value or can take a step.
Prove or disprove these two properties for the combined language. *)
(* FILL IN HERE *)
(** [] *)
End Combined.
(* ########################################################### *)
(** * Small-Step Imp *)
(** For a more serious example, here is the small-step version of the
Imp operational semantics. *)
(** The small-step evaluation relations for arithmetic and boolean
expressions are straightforward extensions of the tiny language
we've been working up to now. To make them easier to read, we
introduce the symbolic notations [==>a] and [==>b], respectively,
for the arithmetic and boolean step relations. *)
Inductive aval : aexp -> Prop :=
av_num : forall n, aval (ANum n).
(** We are not actually going to bother to define boolean
values, since they aren't needed in the definition of [==>b]
below (why?), though they might be if our language were a bit
larger (why?). *)
Reserved Notation " t '/' st '==>a' t' " (at level 40, st at level 39).
Inductive astep : state -> aexp -> aexp -> Prop :=
| AS_Id : forall st i,
AId i / st ==>a ANum (st i)
| AS_Plus : forall st n1 n2,
APlus (ANum n1) (ANum n2) / st ==>a ANum (n1 + n2)
| AS_Plus1 : forall st a1 a1' a2,
a1 / st ==>a a1' ->
(APlus a1 a2) / st ==>a (APlus a1' a2)
| AS_Plus2 : forall st v1 a2 a2',
aval v1 ->
a2 / st ==>a a2' ->
(APlus v1 a2) / st ==>a (APlus v1 a2')
| AS_Minus : forall st n1 n2,
(AMinus (ANum n1) (ANum n2)) / st ==>a (ANum (minus n1 n2))
| AS_Minus1 : forall st a1 a1' a2,
a1 / st ==>a a1' ->
(AMinus a1 a2) / st ==>a (AMinus a1' a2)
| AS_Minus2 : forall st v1 a2 a2',
aval v1 ->
a2 / st ==>a a2' ->
(AMinus v1 a2) / st ==>a (AMinus v1 a2')
| AS_Mult : forall st n1 n2,
(AMult (ANum n1) (ANum n2)) / st ==>a (ANum (mult n1 n2))
| AS_Mult1 : forall st a1 a1' a2,
a1 / st ==>a a1' ->
(AMult (a1) (a2)) / st ==>a (AMult (a1') (a2))
| AS_Mult2 : forall st v1 a2 a2',
aval v1 ->
a2 / st ==>a a2' ->
(AMult v1 a2) / st ==>a (AMult v1 a2')
where " t '/' st '==>a' t' " := (astep st t t').
Reserved Notation " t '/' st '==>b' t' " (at level 40, st at level 39).
Inductive bstep : state -> bexp -> bexp -> Prop :=
| BS_Eq : forall st n1 n2,
(BEq (ANum n1) (ANum n2)) / st ==>b
(if (beq_nat n1 n2) then BTrue else BFalse)
| BS_Eq1 : forall st a1 a1' a2,
a1 / st ==>a a1' ->
(BEq a1 a2) / st ==>b (BEq a1' a2)
| BS_Eq2 : forall st v1 a2 a2',
aval v1 ->
a2 / st ==>a a2' ->
(BEq v1 a2) / st ==>b (BEq v1 a2')
| BS_LtEq : forall st n1 n2,
(BLe (ANum n1) (ANum n2)) / st ==>b
(if (ble_nat n1 n2) then BTrue else BFalse)
| BS_LtEq1 : forall st a1 a1' a2,
a1 / st ==>a a1' ->
(BLe a1 a2) / st ==>b (BLe a1' a2)
| BS_LtEq2 : forall st v1 a2 a2',
aval v1 ->
a2 / st ==>a a2' ->
(BLe v1 a2) / st ==>b (BLe v1 (a2'))
| BS_NotTrue : forall st,
(BNot BTrue) / st ==>b BFalse
| BS_NotFalse : forall st,
(BNot BFalse) / st ==>b BTrue
| BS_NotStep : forall st b1 b1',
b1 / st ==>b b1' ->
(BNot b1) / st ==>b (BNot b1')
| BS_AndTrueTrue : forall st,
(BAnd BTrue BTrue) / st ==>b BTrue
| BS_AndTrueFalse : forall st,
(BAnd BTrue BFalse) / st ==>b BFalse
| BS_AndFalse : forall st b2,
(BAnd BFalse b2) / st ==>b BFalse
| BS_AndTrueStep : forall st b2 b2',
b2 / st ==>b b2' ->
(BAnd BTrue b2) / st ==>b (BAnd BTrue b2')
| BS_AndStep : forall st b1 b1' b2,
b1 / st ==>b b1' ->
(BAnd b1 b2) / st ==>b (BAnd b1' b2)
where " t '/' st '==>b' t' " := (bstep st t t').
(** The semantics of commands is the interesting part. We need two
small tricks to make it work:
- We use [SKIP] as a "command value" -- i.e., a command that
has reached a normal form.
- An assignment command reduces to [SKIP] (and an updated
state).
- The sequencing command waits until its left-hand
subcommand has reduced to [SKIP], then throws it away so
that reduction can continue with the right-hand
subcommand.
- We reduce a [WHILE] command by transforming it into a
conditional followed by the same [WHILE]. *)
(** (There are other ways of achieving the effect of the latter
trick, but they all share the feature that the original [WHILE]
command needs to be saved somewhere while a single copy of the loop
body is being evaluated.) *)
Reserved Notation " t '/' st '==>' t' '/' st' "
(at level 40, st at level 39, t' at level 39).
Inductive cstep : (com * state) -> (com * state) -> Prop :=
| CS_AssStep : forall st i a a',
a / st ==>a a' ->
(i ::= a) / st ==> (i ::= a') / st
| CS_Ass : forall st i n,
(i ::= (ANum n)) / st ==> SKIP / (update st i n)
| CS_SeqStep : forall st c1 c1' st' c2,
c1 / st ==> c1' / st' ->
(c1 ;; c2) / st ==> (c1' ;; c2) / st'
| CS_SeqFinish : forall st c2,
(SKIP ;; c2) / st ==> c2 / st
| CS_IfTrue : forall st c1 c2,
IFB BTrue THEN c1 ELSE c2 FI / st ==> c1 / st
| CS_IfFalse : forall st c1 c2,
IFB BFalse THEN c1 ELSE c2 FI / st ==> c2 / st
| CS_IfStep : forall st b b' c1 c2,
b / st ==>b b' ->
IFB b THEN c1 ELSE c2 FI / st ==> (IFB b' THEN c1 ELSE c2 FI) / st
| CS_While : forall st b c1,
(WHILE b DO c1 END) / st
==> (IFB b THEN (c1;; (WHILE b DO c1 END)) ELSE SKIP FI) / st
where " t '/' st '==>' t' '/' st' " := (cstep (t,st) (t',st')).
(* ########################################################### *)
(** * Concurrent Imp *)
(** Finally, to show the power of this definitional style, let's
enrich Imp with a new form of command that runs two subcommands in
parallel and terminates when both have terminated. To reflect the
unpredictability of scheduling, the actions of the subcommands may
be interleaved in any order, but they share the same memory and
can communicate by reading and writing the same variables. *)
Module CImp.
Inductive com : Type :=
| CSkip : com
| CAss : id -> aexp -> com
| CSeq : com -> com -> com
| CIf : bexp -> com -> com -> com
| CWhile : bexp -> com -> com
(* New: *)
| CPar : com -> com -> com.
Tactic Notation "com_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "SKIP" | Case_aux c "::=" | Case_aux c ";"
| Case_aux c "IFB" | Case_aux c "WHILE" | Case_aux c "PAR" ].
Notation "'SKIP'" :=
CSkip.
Notation "x '::=' a" :=
(CAss x a) (at level 60).
Notation "c1 ;; c2" :=
(CSeq c1 c2) (at level 80, right associativity).
Notation "'WHILE' b 'DO' c 'END'" :=
(CWhile b c) (at level 80, right associativity).
Notation "'IFB' b 'THEN' c1 'ELSE' c2 'FI'" :=
(CIf b c1 c2) (at level 80, right associativity).
Notation "'PAR' c1 'WITH' c2 'END'" :=
(CPar c1 c2) (at level 80, right associativity).
Inductive cstep : (com * state) -> (com * state) -> Prop :=
(* Old part *)
| CS_AssStep : forall st i a a',
a / st ==>a a' ->
(i ::= a) / st ==> (i ::= a') / st
| CS_Ass : forall st i n,
(i ::= (ANum n)) / st ==> SKIP / (update st i n)
| CS_SeqStep : forall st c1 c1' st' c2,
c1 / st ==> c1' / st' ->
(c1 ;; c2) / st ==> (c1' ;; c2) / st'
| CS_SeqFinish : forall st c2,
(SKIP ;; c2) / st ==> c2 / st
| CS_IfTrue : forall st c1 c2,
(IFB BTrue THEN c1 ELSE c2 FI) / st ==> c1 / st
| CS_IfFalse : forall st c1 c2,
(IFB BFalse THEN c1 ELSE c2 FI) / st ==> c2 / st
| CS_IfStep : forall st b b' c1 c2,
b /st ==>b b' ->
(IFB b THEN c1 ELSE c2 FI) / st ==> (IFB b' THEN c1 ELSE c2 FI) / st
| CS_While : forall st b c1,
(WHILE b DO c1 END) / st ==>
(IFB b THEN (c1;; (WHILE b DO c1 END)) ELSE SKIP FI) / st
(* New part: *)
| CS_Par1 : forall st c1 c1' c2 st',
c1 / st ==> c1' / st' ->
(PAR c1 WITH c2 END) / st ==> (PAR c1' WITH c2 END) / st'
| CS_Par2 : forall st c1 c2 c2' st',
c2 / st ==> c2' / st' ->
(PAR c1 WITH c2 END) / st ==> (PAR c1 WITH c2' END) / st'
| CS_ParDone : forall st,
(PAR SKIP WITH SKIP END) / st ==> SKIP / st
where " t '/' st '==>' t' '/' st' " := (cstep (t,st) (t',st')).
Definition cmultistep := multi cstep.
Notation " t '/' st '==>*' t' '/' st' " :=
(multi cstep (t,st) (t',st'))
(at level 40, st at level 39, t' at level 39).
(** Among the many interesting properties of this language is the fact
that the following program can terminate with the variable [X] set
to any value... *)
Definition par_loop : com :=
PAR
Y ::= ANum 1
WITH
WHILE BEq (AId Y) (ANum 0) DO
X ::= APlus (AId X) (ANum 1)
END
END.
(** In particular, it can terminate with [X] set to [0]: *)
Example par_loop_example_0:
exists st',
par_loop / empty_state ==>* SKIP / st'
/\ st' X = 0.
Proof.
eapply ex_intro. split.
unfold par_loop.
eapply multi_step. apply CS_Par1.
apply CS_Ass.
eapply multi_step. apply CS_Par2. apply CS_While.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq1. apply AS_Id.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq. simpl.
eapply multi_step. apply CS_Par2. apply CS_IfFalse.
eapply multi_step. apply CS_ParDone.
eapply multi_refl.
reflexivity. Qed.
(** It can also terminate with [X] set to [2]: *)
Example par_loop_example_2:
exists st',
par_loop / empty_state ==>* SKIP / st'
/\ st' X = 2.
Proof.
eapply ex_intro. split.
eapply multi_step. apply CS_Par2. apply CS_While.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq1. apply AS_Id.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq. simpl.
eapply multi_step. apply CS_Par2. apply CS_IfTrue.
eapply multi_step. apply CS_Par2. apply CS_SeqStep.
apply CS_AssStep. apply AS_Plus1. apply AS_Id.
eapply multi_step. apply CS_Par2. apply CS_SeqStep.
apply CS_AssStep. apply AS_Plus.
eapply multi_step. apply CS_Par2. apply CS_SeqStep.
apply CS_Ass.
eapply multi_step. apply CS_Par2. apply CS_SeqFinish.
eapply multi_step. apply CS_Par2. apply CS_While.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq1. apply AS_Id.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq. simpl.
eapply multi_step. apply CS_Par2. apply CS_IfTrue.
eapply multi_step. apply CS_Par2. apply CS_SeqStep.
apply CS_AssStep. apply AS_Plus1. apply AS_Id.
eapply multi_step. apply CS_Par2. apply CS_SeqStep.
apply CS_AssStep. apply AS_Plus.
eapply multi_step. apply CS_Par2. apply CS_SeqStep.
apply CS_Ass.
eapply multi_step. apply CS_Par1. apply CS_Ass.
eapply multi_step. apply CS_Par2. apply CS_SeqFinish.
eapply multi_step. apply CS_Par2. apply CS_While.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq1. apply AS_Id.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq. simpl.
eapply multi_step. apply CS_Par2. apply CS_IfFalse.
eapply multi_step. apply CS_ParDone.
eapply multi_refl.
reflexivity. Qed.
(** More generally... *)
(** **** Exercise: 3 stars, optional *)
Lemma par_body_n__Sn : forall n st,
st X = n /\ st Y = 0 ->
par_loop / st ==>* par_loop / (update st X (S n)).
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** **** Exercise: 3 stars, optional *)
Lemma par_body_n : forall n st,
st X = 0 /\ st Y = 0 ->
exists st',
par_loop / st ==>* par_loop / st' /\ st' X = n /\ st' Y = 0.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(** ... the above loop can exit with [X] having any value
whatsoever. *)
Theorem par_loop_any_X:
forall n, exists st',
par_loop / empty_state ==>* SKIP / st'
/\ st' X = n.
Proof.
intros n.
destruct (par_body_n n empty_state).
split; unfold update; reflexivity.
rename x into st.
inversion H as [H' [HX HY]]; clear H.
exists (update st Y 1). split.
eapply multi_trans with (par_loop,st). apply H'.
eapply multi_step. apply CS_Par1. apply CS_Ass.
eapply multi_step. apply CS_Par2. apply CS_While.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq1. apply AS_Id. rewrite update_eq.
eapply multi_step. apply CS_Par2. apply CS_IfStep.
apply BS_Eq. simpl.
eapply multi_step. apply CS_Par2. apply CS_IfFalse.
eapply multi_step. apply CS_ParDone.
apply multi_refl.
rewrite update_neq. assumption. intro X; inversion X.
Qed.
End CImp.
(* ########################################################### *)
(** * A Small-Step Stack Machine *)
(** Last example: a small-step semantics for the stack machine example
from Imp.v. *)
Definition stack := list nat.
Definition prog := list sinstr.
Inductive stack_step : state -> prog * stack -> prog * stack -> Prop :=
| SS_Push : forall st stk n p',
stack_step st (SPush n :: p', stk) (p', n :: stk)
| SS_Load : forall st stk i p',
stack_step st (SLoad i :: p', stk) (p', st i :: stk)
| SS_Plus : forall st stk n m p',
stack_step st (SPlus :: p', n::m::stk) (p', (m+n)::stk)
| SS_Minus : forall st stk n m p',
stack_step st (SMinus :: p', n::m::stk) (p', (m-n)::stk)
| SS_Mult : forall st stk n m p',
stack_step st (SMult :: p', n::m::stk) (p', (m*n)::stk).
Theorem stack_step_deterministic : forall st,
deterministic (stack_step st).
Proof.
unfold deterministic. intros st x y1 y2 H1 H2.
induction H1; inversion H2; reflexivity.
Qed.
Definition stack_multistep st := multi (stack_step st).
(** **** Exercise: 3 stars, advanced (compiler_is_correct) *)
(** Remember the definition of [compile] for [aexp] given in the
[Imp] chapter. We want now to prove [compile] correct with respect
to the stack machine.
State what it means for the compiler to be correct according to
the stack machine small step semantics and then prove it. *)
Definition compiler_is_correct_statement : Prop :=
(* FILL IN HERE *) admit.
Theorem compiler_is_correct : compiler_is_correct_statement.
Proof.
(* FILL IN HERE *) Admitted.
(** [] *)
(* $Date: 2014-04-02 09:55:30 -0500 (Wed, 02 Apr 2014) $ *)