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Types.v
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Types.v
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(** * Types: Type Systems *)
Require Export Smallstep.
Ltac inv H := inversion H; subst; clear H.
Hint Constructors multi.
(** Our next major topic is _type systems_ -- static program
analyses that classify expressions according to the "shapes" of
their results. We'll begin with a typed version of a very simple
language with just booleans and numbers, to introduce the basic
ideas of types, typing rules, and the fundamental theorems about
type systems: _type preservation_ and _progress_. Then we'll move
on to the _simply typed lambda-calculus_, which lives at the core
of every modern functional programming language (including
Coq). *)
(* ###################################################################### *)
(** * Typed Arithmetic Expressions *)
(** To motivate the discussion of type systems, let's begin as
usual with an extremely simple toy language. We want it to have
the potential for programs "going wrong" because of runtime type
errors, so we need something a tiny bit more complex than the
language of constants and addition that we used in chapter
[Smallstep]: a single kind of data (just numbers) is too simple,
but just two kinds (numbers and booleans) already gives us enough
material to tell an interesting story.
The language definition is completely routine. The only thing to
notice is that we are _not_ using the [asnum]/[aslist] trick that
we used in chapter [HoareList] to make all the operations total by
forcibly coercing the arguments to [+] (for example) into numbers.
Instead, we simply let terms get stuck if they try to use an
operator with the wrong kind of operands: the [step] relation
doesn't relate them to anything. *)
(* ###################################################################### *)
(** ** Syntax *)
(** Informally:
t ::= true
| false
| if t then t else t
| 0
| succ t
| pred t
| iszero t
Formally:
*)
Inductive tm : Type :=
| ttrue : tm
| tfalse : tm
| tif : tm -> tm -> tm -> tm
| tzero : tm
| tsucc : tm -> tm
| tpred : tm -> tm
| tiszero : tm -> tm.
(** _Values_ are [true], [false], and numeric values... *)
Inductive bvalue : tm -> Prop :=
| bv_true : bvalue ttrue
| bv_false : bvalue tfalse.
Inductive nvalue : tm -> Prop :=
| nv_zero : nvalue tzero
| nv_succ : forall t, nvalue t -> nvalue (tsucc t).
Definition value (t:tm) := bvalue t \/ nvalue t.
Hint Constructors bvalue nvalue.
Hint Unfold value.
Hint Unfold extend.
(* ###################################################################### *)
(** ** Operational Semantics *)
(** Informally: *)
(**
------------------------------ (ST_IfTrue)
if true then t1 else t2 ==> t1
------------------------------- (ST_IfFalse)
if false then t1 else t2 ==> t2
t1 ==> t1'
------------------------- (ST_If)
if t1 then t2 else t3 ==>
if t1' then t2 else t3
t1 ==> t1'
-------------------- (ST_Succ)
succ t1 ==> succ t1'
------------ (ST_PredZero)
pred 0 ==> 0
numeric value v1
--------------------- (ST_PredSucc)
pred (succ v1) ==> v1
t1 ==> t1'
-------------------- (ST_Pred)
pred t1 ==> pred t1'
----------------- (ST_IszeroZero)
iszero 0 ==> true
numeric value v1
-------------------------- (ST_IszeroSucc)
iszero (succ v1) ==> false
t1 ==> t1'
------------------------ (ST_Iszero)
iszero t1 ==> iszero t1'
*)
(** Formally: *)
Reserved Notation "t1 '==>' t2" (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)
| ST_Succ : forall t1 t1',
t1 ==> t1' ->
(tsucc t1) ==> (tsucc t1')
| ST_PredZero :
(tpred tzero) ==> tzero
| ST_PredSucc : forall t1,
nvalue t1 ->
(tpred (tsucc t1)) ==> t1
| ST_Pred : forall t1 t1',
t1 ==> t1' ->
(tpred t1) ==> (tpred t1')
| ST_IszeroZero :
(tiszero tzero) ==> ttrue
| ST_IszeroSucc : forall t1,
nvalue t1 ->
(tiszero (tsucc t1)) ==> tfalse
| ST_Iszero : forall t1 t1',
t1 ==> t1' ->
(tiszero t1) ==> (tiszero t1')
where "t1 '==>' t2" := (step t1 t2).
Tactic Notation "step_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "ST_IfTrue" | Case_aux c "ST_IfFalse" | Case_aux c "ST_If"
| Case_aux c "ST_Succ" | Case_aux c "ST_PredZero"
| Case_aux c "ST_PredSucc" | Case_aux c "ST_Pred"
| Case_aux c "ST_IszeroZero" | Case_aux c "ST_IszeroSucc"
| Case_aux c "ST_Iszero" ].
Hint Constructors step.
(** Notice that the [step] relation doesn't care about whether
expressions make global sense -- it just checks that the operation
in the _next_ reduction step is being applied to the right kinds
of operands.
For example, the term [succ true] (i.e., [tsucc ttrue] in the
formal syntax) cannot take a step, but the almost as obviously
nonsensical term
succ (if true then true else true)
can take a step (once, before becoming stuck). *)
(* ###################################################################### *)
(** ** Normal Forms and Values *)
(** The first interesting thing about the [step] relation in this
language is that the strong progress theorem from the Smallstep
chapter fails! That is, there are terms that are normal
forms (they can't take a step) but not values (because we have not
included them in our definition of possible "results of
evaluation"). Such terms are _stuck_. *)
Notation step_normal_form := (normal_form step).
Definition stuck (t:tm) : Prop :=
step_normal_form t /\ ~ value t.
Hint Unfold stuck.
(** **** Exercise: 2 stars (some_term_is_stuck) *)
Example some_term_is_stuck :
exists t, stuck t.
Proof.
exists (tif tzero tzero tzero).
split.
unfold normal_form, not.
intros.
inv H.
inv H0.
inv H4.
unfold not.
intros.
inv H.
inv H0.
inv H0.
Qed.
(** However, although values and normal forms are not the same in this
language, the former set is included in the latter. This is
important because it shows we did not accidentally define things
so that some value could still take a step. *)
(** **** Exercise: 3 stars, advanced (value_is_nf) *)
(** Hint: You will reach a point in this proof where you need to
use an induction to reason about a term that is known to be a
numeric value. This induction can be performed either over the
term itself or over the evidence that it is a numeric value. The
proof goes through in either case, but you will find that one way
is quite a bit shorter than the other. For the sake of the
exercise, try to complete the proof both ways. *)
Lemma value_is_nf : forall t,
value t -> step_normal_form t.
Proof.
intros.
inv H;
unfold normal_form, not;
intros;
inv H. inv H0. inv H1. inv H1.
generalize dependent x.
induction H0; intros.
inv H1.
inv H1.
generalize (IHnvalue t1'); intro T.
apply T. auto.
Qed.
(** **** Exercise: 3 stars, optional (step_deterministic) *)
(** Using [value_is_nf], we can show that the [step] relation is
also deterministic... *)
Ltac find_eqn :=
match goal with
H1: forall x, ?P x -> ?L = ?R, H2: ?P ?X |- _ =>
rewrite (H1 X H2) in *
end.
Ltac rwinv H1 H2 := rewrite H1 in H2; inv H2.
Ltac find_rwinv :=
match goal with
H1: ?E = true, H2: ?E = false |- _ => rwinv H1 H2
end.
Ltac value_pre_fail :=
match goal with
H1: ?E ==> _, H2: value ?E |- _ => inv H1
end.
Ltac value_pre :=
match goal with
| H1: ttrue ==> _ |- _ => inv H1
| H1: tfalse ==> _ |- _ => inv H1
| H1: tzero ==> _ |- _ => inv H1
(* | H1: tsucc ?t ==> _ |- _ => inv H1 *)
(*
| H1: ?t ==> _, H2: nvalue ?t |- _ => inv H2; inv H1
| H1: ?t ==> _, H2: bvalue ?t |- _ => inv H2; inv H1
*)
end.
(*
Ltac value_inv :=
match goal with
| H1: nvalue ?t |- _ => inv H1
| H1: bvalue ?t |- _ => inv H1
end.
*)
(*
Hint Constructors nvalue.
Hint Constructors bvalue.
*)
(*
Ltac apply_subst :=
match goal with
| H1 : forall x, ?P x -> ?L = ?R, H2: ?P
*)
(*
Lemma nvalue_succ_pred : (forall t1 t2,
nvalue t1 ->
tsucc t1 ==> t2 ->
t1 = tpred t2).
Proof.
(*
unfold not; intros.
generalize (H tzero (tsucc tzero)); intro T.
assert(G : nvalue tzero) by constructor.
apply T in G. inv G.
inv G.
*)
intros. generalize dependent t2.
induction H; intros.
inv H0. inv H1.
inv H0. generalize (IHnvalue t1' H2); intro T.
rewrite T.
inv H2.
inv H.
(*
tsucc (tpred (tsucc t1'0)) = tpred (tsucc (tsucc t1'0))
t1 : tm
H : nvalue t1
t1' : tm
H1 : tsucc t1 ==> t1'
============================
t1 = tpred t1'
*)
(* pred -> not nvalue *)
Qed.
*)
Lemma nvalue_not_succ : forall t1 t2,
(*
~(nvalue t1 ->
tsucc t1 ==> t2).
*)
nvalue t1 ->
(* ~(tsucc t1 ==> t2). *)
tsucc t1 ==> t2 ->
False.
Proof.
(* unfold not. *)
induction t1; intros; inv H.
inv H0; inv H1.
inv H0.
generalize (IHt1 t1' H2 H1); intro T. auto.
Qed.
Theorem step_deterministic:
deterministic step.
Proof with eauto.
unfold deterministic.
intros.
generalize dependent y2.
induction H; intros st H2; inv H2;
auto; try value_pre; try find_eqn; try value_pre; auto.
assert(G : False) by (apply (nvalue_not_succ t1 t1' H H1)). inv G.
assert(G : False) by (apply (nvalue_not_succ st t1' H1 H)). inv G.
eapply nvalue_not_succ in H. inv H. eauto.
eapply nvalue_not_succ in H1. inv H1. eauto.
(*
apply nvalue_succ_pred; auto.
symmetry. apply nvalue_succ_pred; auto.
eapply nvalue_not_succ in H. unfold not in H. apply H in H1. inv H1.
eapply nvalue_not_succ in H. inv H. assumption.
*)
(*
inv H1. symmetry. apply ST_IszeroSucc. constructor.
generalize dependent t1'.
induction H; intros. inv H1. inv H0.
inv H1. generalize (IHnvalue t1'0 H2); intro T. rewrite T.
inv H1.
generalize dependent t1'0.
induction t1; inv H; intros. inv H2. inv H2.
generalize (IHt1 H1 t1' H0); intro T. rewrite T.
*)
Qed.
(* ###################################################################### *)
(** ** Typing *)
(** The next critical observation about this language is that,
although there are stuck terms, they are all "nonsensical", mixing
booleans and numbers in a way that we don't even _want_ to have a
meaning. We can easily exclude such ill-typed terms by defining a
_typing relation_ that relates terms to the types (either numeric
or boolean) of their final results. *)
Inductive ty : Type :=
| TBool : ty
| TNat : ty.
(** In informal notation, the typing relation is often written
[|- t \in T], pronounced "[t] has type [T]." The [|-] symbol is
called a "turnstile". (Below, we're going to see richer typing
relations where an additional "context" argument is written to the
left of the turnstile. Here, the context is always empty.) *)
(**
---------------- (T_True)
|- true \in Bool
----------------- (T_False)
|- false \in Bool
|- t1 \in Bool |- t2 \in T |- t3 \in T
-------------------------------------------- (T_If)
|- if t1 then t2 else t3 \in T
------------ (T_Zero)
|- 0 \in Nat
|- t1 \in Nat
------------------ (T_Succ)
|- succ t1 \in Nat
|- t1 \in Nat
------------------ (T_Pred)
|- pred t1 \in Nat
|- t1 \in Nat
--------------------- (T_IsZero)
|- iszero t1 \in Bool
*)
Reserved Notation "'|-' t '\in' T" (at level 40).
Inductive has_type : tm -> ty -> Prop :=
| T_True :
|- ttrue \in TBool
| T_False :
|- tfalse \in TBool
| T_If : forall t1 t2 t3 T,
|- t1 \in TBool ->
|- t2 \in T ->
|- t3 \in T ->
|- tif t1 t2 t3 \in T
| T_Zero :
|- tzero \in TNat
| T_Succ : forall t1,
|- t1 \in TNat ->
|- tsucc t1 \in TNat
| T_Pred : forall t1,
|- t1 \in TNat ->
|- tpred t1 \in TNat
| T_Iszero : forall t1,
|- t1 \in TNat ->
|- tiszero t1 \in TBool
where "'|-' t '\in' T" := (has_type t T).
Tactic Notation "has_type_cases" tactic(first) ident(c) :=
first;
[ Case_aux c "T_True" | Case_aux c "T_False" | Case_aux c "T_If"
| Case_aux c "T_Zero" | Case_aux c "T_Succ" | Case_aux c "T_Pred"
| Case_aux c "T_Iszero" ].
Hint Constructors has_type.
(* ###################################################################### *)
(** *** Examples *)
(** It's important to realize that the typing relation is a
_conservative_ (or _static_) approximation: it does not calculate
the type of the normal form of a term. *)
Example has_type_1 :
|- tif tfalse tzero (tsucc tzero) \in TNat.
Proof.
apply T_If.
apply T_False.
apply T_Zero.
apply T_Succ.
apply T_Zero.
Qed.
(** (Since we've included all the constructors of the typing relation
in the hint database, the [auto] tactic can actually find this
proof automatically.) *)
Example has_type_not :
~ (|- tif tfalse tzero ttrue \in TBool).
Proof.
intros Contra. solve by inversion 2. Qed.
(** **** Exercise: 1 star, optional (succ_hastype_nat__hastype_nat) *)
Example succ_hastype_nat__hastype_nat : forall t,
|- tsucc t \in TNat ->
|- t \in TNat.
Proof.
intros.
induction t; inv H; assumption.
Qed.
(* ###################################################################### *)
(** ** Canonical forms *)
(** The following two lemmas capture the basic property that defines
the shape of well-typed values. They say that the definition of value
and the typing relation agree. *)
Lemma bool_canonical : forall t,
|- t \in TBool -> value t -> bvalue t.
Proof.
intros t HT HV.
inversion HV; auto.
induction H; inversion HT; auto.
Qed.
Lemma nat_canonical : forall t,
|- t \in TNat -> value t -> nvalue t.
Proof.
intros t HT HV.
inversion HV.
inversion H; subst; inversion HT.
auto.
Qed.
Lemma not_TNat_implies_nvalue :
~(forall t,
|- t \in TNat -> nvalue t).
Proof.
unfold not; intros.
generalize (H (tif ttrue tzero tzero)); intro T.
assert(G : (|-tif ttrue tzero tzero \in TNat)) by repeat constructor.
apply T in G. inv G.
Qed.
(* ###################################################################### *)
(** ** Progress *)
(** The typing relation enjoys two critical properties. The first is
that well-typed normal forms are values (i.e., not stuck). *)
(*
Lemma bvalue_is_value : forall t,
bvalue t ->
value t.
Proof. intros. constructor. assumption. Qed.
Lemma nvalue_is_value : forall t,
nvalue t ->
value t.
Proof. intros. unfold value. right. assumption. Qed.
*)
Theorem progress : forall t T,
|- t \in T ->
value t \/ exists t', t ==> t'.
(** **** Exercise: 3 stars (finish_progress) *)
(** Complete the formal proof of the [progress] property. (Make sure
you understand the informal proof fragment in the following
exercise before starting -- this will save you a lot of time.) *)
Proof with auto.
intros t T HT.
has_type_cases (induction HT) Case...
(* The cases that were obviously values, like T_True and
T_False, were eliminated immediately by auto *)
Case "T_If".
right. inversion IHHT1; clear IHHT1.
SCase "t1 is a value".
apply (bool_canonical t1 HT1) in H.
inversion H; subst; clear H.
exists t2...
exists t3...
SCase "t1 can take a step".
inversion H as [t1' H1].
exists (tif t1' t2 t3)...
Case "T_Succ".
inv IHHT.
SCase "left".
left. apply nat_canonical in H. induction H.
unfold value; right. repeat constructor.
unfold value; right. constructor. constructor. assumption. assumption.
SCase "right".
inv H. right. exists (tsucc x)...
Case "T_Pred".
inv IHHT.
SCase "left".
apply nat_canonical in H.
inv H. right. exists tzero...
right. exists t... assumption.
SCase "right".
inv H. right. exists (tpred x)...
Case "T_Iszero".
right. inv IHHT.
SCase "left".
apply nat_canonical in H; auto.
inv H. exists ttrue... exists tfalse...
inv H.
exists (tiszero x)...
Qed.
(** [] *)
(** **** Exercise: 3 stars, advanced (finish_progress_informal) *)
(** Complete the corresponding informal proof: *)
(** _Theorem_: If [|- t \in T], then either [t] is a value or else
[t ==> t'] for some [t']. *)
(** _Proof_: By induction on a derivation of [|- t \in T].
- If the last rule in the derivation is [T_If], then [t = if t1
then t2 else t3], with [|- t1 \in Bool], [|- t2 \in T] and [|- t3
\in T]. By the IH, either [t1] is a value or else [t1] can step
to some [t1'].
- If [t1] is a value, then by the canonical forms lemmas
and the fact that [|- t1 \in Bool] we have that [t1]
is a [bvalue] -- i.e., it is either [true] or [false].
If [t1 = true], then [t] steps to [t2] by [ST_IfTrue],
while if [t1 = false], then [t] steps to [t3] by
[ST_IfFalse]. Either way, [t] can step, which is what
we wanted to show.
- If [t1] itself can take a step, then, by [ST_If], so can
[t].
(* FILL IN HERE *)
[]
*)
(** This is more interesting than the strong progress theorem that we
saw in the Smallstep chapter, where _all_ normal forms were
values. Here, a term can be stuck, but only if it is ill
typed. *)
(** **** Exercise: 1 star (step_review) *)
(** Quick review. Answer _true_ or _false_. In this language...
- Every well-typed normal form is a value.
- Every value is a normal form.
- The single-step evaluation relation is
a partial function (i.e., it is deterministic).
- The single-step evaluation relation is a _total_ function.
*)
(** [] *)
(*
- Every well-typed normal form is a value.
*)
Example nf_is_not_always_value :
~(forall t, step_normal_form t -> value t).
Proof.
unfold normal_form, not.
intros.
generalize (H (tif tzero tzero tzero)); intro T.
assert(G : (exists t', tif tzero tzero tzero ==> t') -> False).
intros. inv H0. inv H1. inv H5.
apply T in G.
inv G. inv H0. inv H0.
Qed.
(*
- Every value is a normal form.
value_is_nf
: forall t : tm, value t -> step_normal_form t
*)
(*
- The single-step evaluation relation is
a partial function (i.e., it is deterministic).
Theorem step_deterministic:
deterministic step.
*)
(*
- The single-step evaluation relation is a _total_ function.
Theorem step_deterministic:
deterministic step.
*)
(* ###################################################################### *)
(** ** Type Preservation *)
(** The second critical property of typing is that, when a well-typed
term takes a step, the result is also a well-typed term.
This theorem is often called the _subject reduction_ property,
because it tells us what happens when the "subject" of the typing
relation is reduced. This terminology comes from thinking of
typing statements as sentences, where the term is the subject and
the type is the predicate. *)
Theorem preservation : forall t t' T,
|- t \in T ->
t ==> t' ->
|- t' \in T.
(** **** Exercise: 2 stars (finish_preservation) *)
(** Complete the formal proof of the [preservation] property. (Again,
make sure you understand the informal proof fragment in the
following exercise first.) *)
Proof with auto.
intros t t' T HT HE.
generalize dependent t'.
has_type_cases (induction HT) Case;
(* every case needs to introduce a couple of things *)
intros t' HE;
(* and we can deal with several impossible
cases all at once *)
try (solve by inversion).
Case "T_If". inversion HE; subst; clear HE.
SCase "ST_IFTrue". assumption.
SCase "ST_IfFalse". assumption.
SCase "ST_If". apply T_If; try assumption.
apply IHHT1; assumption.
Case "T_Succ". inv HE. apply T_Succ. apply IHHT...
Case "T_Pred". inv HE... inv HT...
Case "T_Iszero". inv HE...
Qed.
(** **** Exercise: 3 stars, advanced (finish_preservation_informal) *)
(** Complete the following proof: *)
(** _Theorem_: If [|- t \in T] and [t ==> t'], then [|- t' \in T]. *)
(** _Proof_: By induction on a derivation of [|- t \in T].
- If the last rule in the derivation is [T_If], then [t = if t1
then t2 else t3], with [|- t1 \in Bool], [|- t2 \in T] and [|- t3
\in T].
Inspecting the rules for the small-step reduction relation and
remembering that [t] has the form [if ...], we see that the
only ones that could have been used to prove [t ==> t'] are
[ST_IfTrue], [ST_IfFalse], or [ST_If].
- If the last rule was [ST_IfTrue], then [t' = t2]. But we
know that [|- t2 \in T], so we are done.
- If the last rule was [ST_IfFalse], then [t' = t3]. But we
know that [|- t3 \in T], so we are done.
- If the last rule was [ST_If], then [t' = if t1' then t2
else t3], where [t1 ==> t1']. We know [|- t1 \in Bool] so,
by the IH, [|- t1' \in Bool]. The [T_If] rule then gives us
[|- if t1' then t2 else t3 \in T], as required.
(* FILL IN HERE *)
[]
*)
(** **** Exercise: 3 stars (preservation_alternate_proof) *)
(** Now prove the same property again by induction on the
_evaluation_ derivation instead of on the typing derivation.
Begin by carefully reading and thinking about the first few
lines of the above proof to make sure you understand what
each one is doing. The set-up for this proof is similar, but
not exactly the same. *)
Theorem preservation' : forall t t' T,
|- t \in T ->
t ==> t' ->
|- t' \in T.
Proof with eauto.
intros.
generalize dependent T.
induction H0; intros; inv H...
inv H0. inv H1. assumption.
inv H0. inv H2. assumption.
inv H0. constructor.
inv H0. constructor.
(*
intros.
generalize dependent t'.
induction H; intros; inv H0...
*)
Qed.
(* ###################################################################### *)
(** ** Type Soundness *)
(** Putting progress and preservation together, we can see that a
well-typed term can _never_ reach a stuck state. *)
Definition multistep := (multi step).
Notation "t1 '==>*' t2" := (multistep t1 t2) (at level 40).
Corollary soundness : forall t t' T,
|- t \in T ->
t ==>* t' ->
~(stuck t').
Proof with auto.
(*
unfold stuck, not; intros.
induction H0; inv H1.
apply H2.
apply progress in H.
inv H... inv H1. unfold normal_form, not in H0. contradiction H0. exists x0...
apply IHmulti... eapply preservation in H0. apply H0. apply H.
*)
intros t t' T HT P. induction P; intros [R S].
destruct (progress x T HT); auto.
apply IHP. apply (preservation x y T HT H).
unfold stuck. split; auto. Qed.
(* ###################################################################### *)
(** * Aside: the [normalize] Tactic *)
(** When experimenting with definitions of programming languages in
Coq, we often want to see what a particular concrete term steps
to -- i.e., we want to find proofs for goals of the form [t ==>*
t'], where [t] is a completely concrete term and [t'] is unknown.
These proofs are simple but repetitive to do by hand. Consider for
example reducing an arithmetic expression using the small-step
relation [astep]. *)
Definition amultistep st := multi (astep st).
Notation " t '/' st '==>a*' t' " := (amultistep st t t')
(at level 40, st at level 39).
Example astep_example1 :
(APlus (ANum 3) (AMult (ANum 3) (ANum 4))) / empty_state
==>a* (ANum 15).
Proof.
apply multi_step with (APlus (ANum 3) (ANum 12)).
apply AS_Plus2.
apply av_num.
apply AS_Mult.
apply multi_step with (ANum 15).
apply AS_Plus.
apply multi_refl.
Qed.
(** We repeatedly apply [multi_step] until we get to a normal
form. The proofs that the intermediate steps are possible are
simple enough that [auto], with appropriate hints, can solve
them. *)
(* Hint Constructors astep aval.*)
Hint Constructors astep.
Hint Constructors aval.
Example astep_example1' :
(APlus (ANum 3) (AMult (ANum 3) (ANum 4))) / empty_state
==>a* (ANum 15).
Proof.
eapply multi_step. auto. simpl.
eapply multi_step. auto. simpl.
apply multi_refl.
Qed.
(** The following custom [Tactic Notation] definition captures this
pattern. In addition, before each [multi_step] we print out the
current goal, so that the user can follow how the term is being
evaluated. *)
Tactic Notation "print_goal" := match goal with |- ?x => idtac x end.
Tactic Notation "normalize" :=
repeat (print_goal; eapply multi_step ;
[ (eauto 10; fail) | (instantiate; simpl)]);
apply multi_refl.
Example astep_example1'' :
(APlus (ANum 3) (AMult (ANum 3) (ANum 4))) / empty_state
==>a* (ANum 15).
Proof.
normalize.
(* At this point in the proof script, the Coq response shows
a trace of how the expression evaluated.
(APlus (ANum 3) (AMult (ANum 3) (ANum 4)) / empty_state ==>a* ANum 15)
(multi (astep empty_state) (APlus (ANum 3) (ANum 12)) (ANum 15))
(multi (astep empty_state) (ANum 15) (ANum 15))
*)
Qed.
(** The [normalize] tactic also provides a simple way to calculate
what the normal form of a term is, by proving a goal with an
existential variable in it. *)
Example astep_example1''' : exists e',
(APlus (ANum 3) (AMult (ANum 3) (ANum 4))) / empty_state
==>a* e'.
Proof.
eapply ex_intro. normalize.
(* This time, the trace will be:
(APlus (ANum 3) (AMult (ANum 3) (ANum 4)) / empty_state ==>a* ??)
(multi (astep empty_state) (APlus (ANum 3) (ANum 12)) ??)
(multi (astep empty_state) (ANum 15) ??)
where ?? is the variable ``guessed'' by eapply.
*)
Qed.
(** **** Exercise: 1 star (normalize_ex) *)
Theorem normalize_ex : exists e',
(AMult (ANum 3) (AMult (ANum 2) (ANum 1))) / empty_state
==>a* e'.
Proof.
eexists.
normalize.
Qed.
(** **** Exercise: 1 star, optional (normalize_ex') *)
(** For comparison, prove it using [apply] instead of [eapply]. *)
Theorem normalize_ex' : exists e',
(AMult (ANum 3) (AMult (ANum 2) (ANum 1))) / empty_state
==>a* e'.
Proof.
eexists. normalize.
Qed.
(* ###################################################################### *)
(** ** Additional Exercises *)
(** **** Exercise: 2 stars (subject_expansion) *)
(** Having seen the subject reduction property, it is reasonable to
wonder whether the opposity property -- subject _expansion_ --
also holds. That is, is it always the case that, if [t ==> t']
and [|- t' \in T], then [|- t \in T]? If so, prove it. If
not, give a counter-example. (You do not need to prove your
counter-example in Coq, but feel free to do so if you like.)
(* FILL IN HERE *)
[]
*)
Theorem not_subject_expansion :
~(forall t t' T,
|- t' \in T ->
t ==> t' ->
|- t \in T).
Proof with auto.
unfold not; intros.
assert(G : |-tzero \in TNat) by constructor.
assert(G2 : tif ttrue tzero tfalse ==> tzero) by constructor.
generalize (H (tif ttrue tzero tfalse) tzero TNat G G2); intro T.
inv T.
inv H6.
Qed.
(** **** Exercise: 2 stars (variation1) *)
(** Suppose, that we add this new rule to the typing relation:
| T_SuccBool : forall t,
|- t \in TBool ->
|- tsucc t \in TBool
Which of the following properties remain true in the presence of
this rule? For each one, write either "remains true" or
else "becomes false." If a property becomes false, give a
counterexample.
- Determinism of [step]
- Progress
- Preservation
[]
*)
Module variation1.
Reserved Notation "'|-' t '\in' T" (at level 40).
Inductive has_type : tm -> ty -> Prop :=
| T_True :
|- ttrue \in TBool
| T_False :
|- tfalse \in TBool
| T_If : forall t1 t2 t3 T,
|- t1 \in TBool ->
|- t2 \in T ->
|- t3 \in T ->
|- tif t1 t2 t3 \in T
| T_Zero :
|- tzero \in TNat
| T_Succ : forall t1,
|- t1 \in TNat ->
|- tsucc t1 \in TNat
| T_Pred : forall t1,
|- t1 \in TNat ->
|- tpred t1 \in TNat
| T_Iszero : forall t1,
|- t1 \in TNat ->
|- tiszero t1 \in TBool
| T_SuccBool : forall t,
|- t \in TBool ->
|- tsucc t \in TBool