(** * Lists: Working with Structured Data *)

Require Export Induction.
Module NatList.

(* ################################################################# *)
(** * Pairs of Numbers *)

(** In an [Inductive] type definition, each constructor can take
    any number of arguments -- none (as with [true] and [O]), one (as
    with [S]), or more than one, as here: *)

Inductive natprod : Type :=
| pair : nat -> nat -> natprod.

(** This declaration can be read: "There is just one way to
    construct a pair of numbers: by applying the constructor [pair] to
    two arguments of type [nat]." *)

Check (pair 3 5).

(** Here are two simple functions for extracting the first and
    second components of a pair.  The definitions also illustrate how
    to do pattern matching on two-argument constructors. *)

Definition fst (p : natprod) : nat :=
  match p with
  | pair x y => x
  end.

Definition snd (p : natprod) : nat :=
  match p with
  | pair x y => y
  end.

Compute (fst (pair 3 5)).
(* ===> 3 *)

(** Since pairs are used quite a bit, it is nice to be able to
    write them with the standard mathematical notation [(x,y)] instead
    of [pair x y].  We can tell Coq to allow this with a [Notation]
    declaration. *)

Notation "( x , y )" := (pair x y).

(** The new pair notation can be used both in expressions and in
    pattern matches (indeed, we've actually seen this already in the
    [Basics] chapter, in the definition of the [minus] function --
    this works because the pair notation is also provided as part of
    the standard library): *)

Compute (fst (3,5)).

Definition fst' (p : natprod) : nat :=
  match p with
  | (x,y) => x
  end.

Definition snd' (p : natprod) : nat :=
  match p with
  | (x,y) => y
  end.

Definition swap_pair (p : natprod) : natprod :=
  match p with
  | (x,y) => (y,x)
  end.

(** Let's try to prove a few simple facts about pairs.

    If we state things in a particular (and slightly peculiar) way, we
    can complete proofs with just reflexivity (and its built-in
    simplification): *)

Theorem surjective_pairing' : forall (n m : nat),
  (n,m) = (fst (n,m), snd (n,m)).
Proof.
  reflexivity. (* [reflexivity] can expand the definitions of [fst] and [snd]
                  to resolve this. *)
Qed.

(* Informal proof:

   Theorem: [forall n m : nat, (n, m) = (fst (n, m), snd (n, m))].

   Proof: by definition of [fst] and [snd].

   - The [fst] of [(n, m)] is [n], and the [snd] of [(n, m)] is [m].
     But that yields [(n, m)], which matches the left side of the equation.

  - So the theorem is true for [n] and [m], by the reflexivity of equality.

  - Since we've shown that the theorem holds for an arbitrary [n] and [m],
    we've shown that it holds for all [n]s and [m]s. []

*)

(** But [reflexivity] is not enough if we state the lemma in a more
    natural way: *)

Theorem surjective_pairing_stuck : forall (p : natprod),
  p = (fst p, snd p). (* Note that [fst p] and [snd p] are not in a form that
                         matches a constructor pattern. The constructors need a pair
                         of the form [fst (_, _)]. But here, we only have [p],
                         and there is not enough information in this theorem for
                         Coq to match [p] to the structure [(_, _)]. *)
Proof.
  simpl. (* Doesn't reduce anything! *)
Abort.

(** We have to expose the structure of [p] so that [simpl] can
    perform the pattern match in [fst] and [snd].  We can do this with
    [destruct]. *)

Theorem surjective_pairing : forall (p : natprod),
  p = (fst p, snd p).
Proof.
  intros p. (* Suppose [p] is a fixed pair. *)
  destruct p as [n m]. (* Let's proceed by case analysis. That is, let's consider
                          the different forms that [p] can have. If we look at the [natprod]
                          constructor, we can see it only has one constructor. So there's
                          only one case here: [pair _ _]. Let's name the first item [n],
                          and the second item [m]. So this will generate a goal
                          where [p] is replaced with [(n, m)]. That is, the goal
                          will become [(n, m) = (fst (n, m), snd (n, m))]. *)
  simpl. (* Then [simpl] can match [fst (n, m)] and [snd (n, m)] to simplify
            the right hand side of the quation to [(n, m)]. *)
  reflexivity. (* Now both sides of the equation match. *)
Qed.

(* Informal proof:

   Theorem: [forall p : natprod, p = (fst p, snd p)].

   Proof: by case analysis on [p].

   - Let [p] be a fixed pair. There is just one form that [p] can take: [(n, m)],
     where [n] and [m] are fixed numbers.

   - So let us replace every [p] with [(n, m)] in the theorem.

   - Then both sides of the equation are the same, which follows from
     the definition of [fst] and [snd].

  - So the theorem is true for [p], by the reflexivity of equality.

  - Since we've shown that the theorem holds for an arbitrary [p],
    we've shown that it holds for all [p]s. []

*)

(** Notice that, unlike its behavior with [nat]s, [destruct]
    generates just one subgoal here.  That's because [natprod]s can
    only be constructed in one way. *)

(** **** Exercise: 1 star (snd_fst_is_swap)  *)
Theorem snd_fst_is_swap : forall (p : natprod),
  (snd p, fst p) = swap_pair p.
Proof.
  intros p. (* Suppose [p] is a fixed pair. *)
  destruct p as [n m]. (* By case analysis, let's consider the one case it can have: [(n, m)].
                          That converts the goal to [(snd (n, m,), fst (n, m)) = swap_pair (n, m)]. *)
  simpl. (* [simpl] can now match the constructors for [snd], [fst], and [swap_pair], and simplify. *)
  reflexivity. (* Both sides of the equation are the same now. *)
Qed.
(** [] *)

(* Informal proof:

  Theorem: [forall p : natprod, (snd p, fst p) = swap_pair p].

  Proof: by case analysis on [p].

  - Suppose [p] be is a fixed pair. Then [p] can have the form [(n, m)], where
    [n] and [m] are fixed numbers.

  - By the definition of [fst] and [snd], the left side of the equation reduces to [(m, n)],
    and by the definition of [swap_pair], the right hand side reduces to [(m, n)].

  - So the theorem is true for [p], by the reflexivity of equality.

  - Since we've shown that the theorem holds for an arbitrary [p],
    we've shown that it holds for all [p]s. []

*)

(** **** Exercise: 1 star, optional (fst_swap_is_snd)  *)
Theorem fst_swap_is_snd : forall (p : natprod),
  fst (swap_pair p) = snd p.
Proof.
  intros p. (* Suppose [p] is a fixed pair. *)
  destruct p as [n m]. (* Consider the one form it can have: [(n, m)]. *)
  simpl. (* [simpl] can match the constructors of [swap_pair], [fst], and [snd] to simplify. *)
  reflexivity. (* Now both sides of the equation are the same. *)
Qed.
(** [] *)


(* ################################################################# *)
(** * Lists of Numbers *)

(** Generalizing the definition of pairs, we can describe the
    type of _lists_ of numbers like this: "A list is either the empty
    list or else a pair of a number and another list." *)

Inductive natlist : Type :=
  | nil  : natlist
  | cons : nat -> natlist -> natlist.

(** For example, here is a three-element list: *)

Definition mylist := cons 1 (cons 2 (cons 3 nil)).

(** As with pairs, it is more convenient to write lists in
    familiar programming notation.  The following declarations
    allow us to use [::] as an infix [cons] operator and square
    brackets as an "outfix" notation for constructing lists. *)

Notation "x :: l" := (cons x l)
                     (at level 60, right associativity).
Notation "[ ]" := nil.
Notation "[ x ; .. ; y ]" := (cons x .. (cons y nil) ..).

(** It is not necessary to understand the details of these
    declarations, but in case you are interested, here is roughly
    what's going on.  The [right associativity] annotation tells Coq
    how to parenthesize expressions involving several uses of [::] so
    that, for example, the next three declarations mean exactly the
    same thing: *)

Definition mylist1 := 1 :: (2 :: (3 :: nil)).
Definition mylist2 := 1 :: 2 :: 3 :: nil.
Definition mylist3 := [1;2;3].

(** The [at level 60] part tells Coq how to parenthesize
    expressions that involve both [::] and some other infix operator.
    For example, since we defined [+] as infix notation for the [plus]
    function at level 50,

  Notation "x + y" := (plus x y)
                      (at level 50, left associativity).

    the [+] operator will bind tighter than [::], so [1 + 2 :: [3]]
    will be parsed, as we'd expect, as [(1 + 2) :: [3]] rather than [1
    + (2 :: [3])].

    (Expressions like "[1 + 2 :: [3]]" can be a little confusing when
    you read them in a [.v] file.  The inner brackets, around 3, indicate
    a list, but the outer brackets, which are invisible in the HTML
    rendering, are there to instruct the "coqdoc" tool that the bracketed
    part should be displayed as Coq code rather than running text.)

    The second and third [Notation] declarations above introduce the
    standard square-bracket notation for lists; the right-hand side of
    the third one illustrates Coq's syntax for declaring n-ary
    notations and translating them to nested sequences of binary
    constructors. *)

(* ----------------------------------------------------------------- *)
(** *** Repeat *)

(** A number of functions are useful for manipulating lists.
    For example, the [repeat] function takes a number [n] and a
    [count] and returns a list of length [count] where every element
    is [n]. *)

Fixpoint repeat (n count : nat) : natlist :=
  match count with
  | O => nil (* If [count] is [0], return the empty list. *)
  | S count' => n :: (repeat n count') (* If [count] is the successor of [count'],
                                          put [n] in front of the list,
                                          and then [repeat n] again [count'] times. *)
  end.

(* ----------------------------------------------------------------- *)
(** *** Length *)

(** The [length] function calculates the length of a list. *)

Fixpoint length (l:natlist) : nat :=
  match l with
  | nil => O (* If [l] is empty, the length is [0]. *)
  | h :: t => S (length t) (* If [l] has a head [h] and a tail [t], then
                              the length will be one more than (the successor [S] of)
                              the length of the tail [t]. *)
  end.

(* ----------------------------------------------------------------- *)
(** *** Append *)

(** The [app] function concatenates (appends) two lists. *)

Fixpoint app (l1 l2 : natlist) : natlist :=
  match l1 with
  | nil    => l2 (* If [l1] is empty, just return [l2]. *)
  | h :: t => h :: (app t l2) (* If [l2] has a head [h] and a tail [t], put [h] at the front
                                 of the list, and then append the tail [t] to [l2]. *)
  end.

(** Actually, [app] will be used a lot in some parts of what
    follows, so it is convenient to have an infix operator for it. *)

Notation "x ++ y" := (app x y)
                     (right associativity, at level 60).

Example test_app1:             [1;2;3] ++ [4;5] = [1;2;3;4;5].
Proof. reflexivity.  Qed.
Example test_app2:             nil ++ [4;5] = [4;5].
Proof. reflexivity.  Qed.
Example test_app3:             [1;2;3] ++ nil = [1;2;3].
Proof. reflexivity.  Qed.

(* ----------------------------------------------------------------- *)
(** *** Head (with default) and Tail *)

(** Here are two smaller examples of programming with lists.
    The [hd] function returns the first element (the "head") of the
    list, while [tl] returns everything but the first
    element (the "tail").
    Of course, the empty list has no first element, so we
    must pass a default value to be returned in that case.  *)

Definition hd (default:nat) (l:natlist) : nat :=
  match l with
  | nil => default (* If [l] is empty, return the [default]. *)
  | h :: t => h (* If [l] has a head [h] and a tail [t], return the head [h]. *)
  end.

Definition tl (l:natlist) : natlist :=
  match l with
  | nil => nil (* If [l] is empty, there is no tail, so return an empty list. *)
  | h :: t => t (* If [l] has a head [h] and a tail [t], return the tail [t]. *)
  end.

Example test_hd1:             hd 0 [1;2;3] = 1.
Proof.
  simpl. (* [simpl] can match the constructors/cases of [hd] to simplify. *)
  reflexivity. (* Now both sides of the equation are the same. *)
Qed.
Example test_hd2:             hd 0 [] = 0.
Proof.
  reflexivity. (* [reflexivity] can do the simplification too. *)
Qed.
Example test_tl:              tl [1;2;3] = [2;3].
Proof. reflexivity.  Qed.


(* ----------------------------------------------------------------- *)
(** *** Exercises *)

(** **** Exercise: 2 stars, recommended (list_funs)  *)
(** Complete the definitions of [nonzeros], [oddmembers] and
    [countoddmembers] below. Have a look at the tests to understand
    what these functions should do. *)

Fixpoint nonzeros (l:natlist) : natlist :=
  match l with
  | nil => nil (* If [l] is empty, return the empty list. *)
  | h :: t => match beq_nat h 0 with (* If [l] has a head [h] and a tail [t], then
                                        check if the head [h] is [0]. *)
              | true => nonzeros t (* If it is, then ignore [h] and
                                      check for nonzeros in the tail [t]. *)
              | false => h :: (nonzeros t) (* If it isn't, put [h] at the front of the return
                                              list, and check for nonzeros in the tail [t]. *)
              end
  end.

Example test_nonzeros:
  nonzeros [0;1;0;2;3;0;0] = [1;2;3].
Proof.
  reflexivity. (* [reflexivity] can match the constructors/cases and simplify
                  until both sides of the equation are the same. *)
Qed.

Fixpoint oddmembers (l:natlist) : natlist :=
  match l with
  | nil => nil
  | h :: t => match oddb h with
              | false => oddmembers t
              | true => h :: (oddmembers t)
              end
  end.

Example test_oddmembers:
  oddmembers [0;1;0;2;3;0;0] = [1;3].
Proof. reflexivity. Qed.

Definition countoddmembers (l:natlist) : nat :=
  length (oddmembers l).

Example test_countoddmembers1:
  countoddmembers [1;0;3;1;4;5] = 4.
Proof. reflexivity. Qed.

Example test_countoddmembers2:
  countoddmembers [0;2;4] = 0.
Proof. reflexivity. Qed.


Example test_countoddmembers3:
  countoddmembers nil = 0.
Proof. reflexivity. Qed.
(** [] *)

(** **** Exercise: 3 stars, advanced (alternate)  *)
(** Complete the definition of [alternate], which "zips up" two lists
    into one, alternating between elements taken from the first list
    and elements from the second.  See the tests below for more
    specific examples.

    Note: one natural and elegant way of writing [alternate] will fail
    to satisfy Coq's requirement that all [Fixpoint] definitions be
    "obviously terminating."  If you find yourself in this rut, look
    for a slightly more verbose solution that considers elements of
    both lists at the same time.  (One possible solution requires
    defining a new kind of pairs, but this is not the only way.)  *)

Fixpoint alternate (l1 l2 : natlist) : natlist :=
  match l1, l2 with
  | nil, nil => nil (* If [l1] and [l2] are both empty, there's nothing to zip up,
                       so return an empty list. *)
  | nil, h :: t => l2 (* If [l1] is empty, but [l2] has a head [h] and a tail [t], then
                         [l2] has some contents, so we can just return that. *)
  | h :: t, nil => l1 (* Ditto if [l1] has contents and [l2] is empty. *)
  | h1 :: t1, h2 :: t2 => h1 :: (h2 :: (alternate t1 t2)) (* If [l1] has head [h1] and a tail [t1],
                      and [l2] has a head [h2] and a tail [t2], then put [h1] and [h2] as the
                      first items of the return list, and then alternate the tails [t1] and [t2]. *)
  end.

Example test_alternate1:
  alternate [1;2;3] [4;5;6] = [1;4;2;5;3;6].
Proof. reflexivity. Qed.

Example test_alternate2:
  alternate [1] [4;5;6] = [1;4;5;6].
Proof. reflexivity. Qed.

Example test_alternate3:
  alternate [1;2;3] [4] = [1;4;2;3].
Proof. reflexivity. Qed.

Example test_alternate4:
  alternate [] [20;30] = [20;30].
Proof. reflexivity. Qed.
(** [] *)

(* ----------------------------------------------------------------- *)
(** *** Bags via Lists *)

(** A [bag] (or [multiset]) is like a set, except that each element
    can appear multiple times rather than just once.  One possible
    implementation is to represent a bag of numbers as a list. *)

Definition bag := natlist.

(** **** Exercise: 3 stars, recommended (bag_functions)  *)
(** Complete the following definitions for the functions
    [count], [sum], [add], and [member] for bags. *)

Fixpoint count (v:nat) (s:bag) : nat :=
  match s with
  | nil => 0 (* If [s] is empty, then there are no [v]s in it. *)
  | h :: t => match beq_nat h v with (* If [s] has a head [h] and a tail [t], then check if
                                        the head [h] is the same value as [v]. *)
              | false => count v t (* If it's not, then ignore [h], and
                                      count the [v]s in the tail [t]. *)
              | true => S (count v t) (* If it is, then the number of [v]s in [s] will be one more
                                         (the successor [S]) than the count of [v]s in the tail [t]. *)
              end
  end.

(** All these proofs can be done just by [reflexivity]. *)

Example test_count1:              count 1 [1;2;3;1;4;1] = 3.
Proof. reflexivity. Qed.
Example test_count2:              count 6 [1;2;3;1;4;1] = 0.
Proof. reflexivity. Qed.

(** Multiset [sum] is similar to set [union]: [sum a b] contains all
    the elements of [a] and of [b].  (Mathematicians usually define
    [union] on multisets a little bit differently -- using max instead
    of sum -- which is why we don't use that name for this operation.)
    For [sum] we're giving you a header that does not give explicit
    names to the arguments.  Moreover, it uses the keyword
    [Definition] instead of [Fixpoint], so even if you had names for
    the arguments, you wouldn't be able to process them recursively.
    The point of stating the question this way is to encourage you to
    think about whether [sum] can be implemented in another way --
    perhaps by using functions that have already been defined.  *)

Definition sum : bag -> bag -> bag := app. (* We can just append all the bags together. *)

Example test_sum1:              count 1 (sum [1;2;3] [1;4;1]) = 3.
Proof.
  reflexivity. (* [reflexivity] can still just match the constructors/cases and simplify. *)
Qed.

Definition add (v:nat) (s:bag) : bag := v :: s. (* We can just put [v] at the front of the bag [s]. *)

Example test_add1:                count 1 (add 1 [1;4;1]) = 3.
Proof. reflexivity. Qed.
Example test_add2:                count 5 (add 1 [1;4;1]) = 0.
Proof. reflexivity. Qed.

Definition member (v:nat) (s:bag) : bool :=
  match count v s with (* Count how many [v]s are in [s]. *)
  | 0 => false (* If there are zero [v]s in [s], then [v] is not a member of [s]. *)
  | _ => true (* If there is any (other) number of [v]s in [s], then [v] is a member of [s]. *)
  end.

Example test_member1:             member 1 [1;4;1] = true.
Proof. reflexivity. Qed.

Example test_member2:             member 2 [1;4;1] = false.
Proof. reflexivity. Qed.
(** [] *)

(** **** Exercise: 3 stars, optional (bag_more_functions)  *)
(* Do not modify the following line: *)
Definition manual_grade_for_bag_theorem : option (prod nat string) := None.
(** Here are some more [bag] functions for you to practice with. *)

(** When [remove_one] is applied to a bag without the number to remove,
   it should return the same bag unchanged. *)

Fixpoint remove_one (v:nat) (s:bag) : bag :=
  match s with
  | nil => nil (* If the bag [s] is empty, there are no [v]s to remove. Just return the empty list. *)
  | h :: t => match beq_nat h v with (* If the bag [s] has a head [h] and a tail [t], check if
                                        the head [h] is the same value as [v]. *)
              | true => t (* If it is, drop [h] and return just the tail [t]. *)
              | false => h :: (remove_one v t) (* If it's not, put [h] at the front of the return
                                                  list, and then remove one [v] from the tail [t]. *)
              end
  end.

Example test_remove_one1:
  count 5 (remove_one 5 [2;1;5;4;1]) = 0.
Proof. reflexivity. Qed.

Example test_remove_one2:
  count 5 (remove_one 5 [2;1;4;1]) = 0.
Proof. reflexivity. Qed.

Example test_remove_one3:
  count 4 (remove_one 5 [2;1;4;5;1;4]) = 2.
Proof. reflexivity. Qed.

Example test_remove_one4:
  count 5 (remove_one 5 [2;1;5;4;5;1;4]) = 1.
Proof. reflexivity. Qed.

Fixpoint remove_all (v:nat) (s:bag) : bag :=
  match s with
  | nil => nil (* If [s] is empty, there are no [v]s to remove. So just return the empty list. *)
  | h :: t => match beq_nat h v with (* If [s] has a head [h] and a tail [t], check if [h]
                                        has the same value as [v]. *)
              | true => (remove_all v t) (* If it does, then drop the [h], and then remove all
                                            [v]s from the tail. *)
              | false => h :: (remove_all v t) (* If it doesn't, put the [h] at the front of the
                                                  return list, and remove all [v]s from [t]. *)
              end
  end.

Example test_remove_all1:  count 5 (remove_all 5 [2;1;5;4;1]) = 0.
Proof. reflexivity. Qed.
Example test_remove_all2:  count 5 (remove_all 5 [2;1;4;1]) = 0.
Proof. reflexivity. Qed.
Example test_remove_all3:  count 4 (remove_all 5 [2;1;4;5;1;4]) = 2.
Proof. reflexivity. Qed.
Example test_remove_all4:  count 5 (remove_all 5 [2;1;5;4;5;1;4;5;1;4]) = 0.
Proof. reflexivity. Qed.

(* Note: an empty multiset is a subset of every other multiset. *)
Fixpoint subset (s1:bag) (s2:bag) : bool :=
  match s1, s2 with
  | nil, nil => true (* If [s1] and [s2] are empty, then the first is a subset of the other. *)
  | nil, h :: t => true (* If [s1] is empty and [s2] has some contents (because it has a head [h]
                           and a tail [t]), then [s1] is a subset of [s2]. *)
  | h :: t, nil => false (* If [s1] has contents (because it has a head [h] and a tail [t]) and [s2]
                            is empty, then [s1] is not a subset of [s2]. *)
  | h1 :: t1, h2 :: t2 => match member h1 s2 with (* If [s1] has a head [h1] and a tail [t1], and if
                            [s2] has a head [h2] and a tail [t2], then check if the head [h1] of the
                            first bag is a member of [s2]. *)
                          | true => subset t1 (remove_one h1 s2) (* If it is, then remove [h1] from
                            [s2], and check if the tail [t1] of the first bag is a subset of that. *)
                          | false => false (* If [h1] is not a member of [s2], then we've found an
                             element in [s1] that's not in [s2]. This means [s1] cannot be a subset
                             of [s2], since to be a subset requires that all members of [s1] are
                             members of [s2]. *)
                          end
  end.

Compute subset [1;2;2] [2;1;4;1].

Example test_subset1:              subset [1;2] [2;1;4;1] = true.
Proof. reflexivity. Qed.
Example test_subset2:              subset [1;2;2] [2;1;4;1] = false.
Proof. reflexivity. Qed.
(** [] *)

(** **** Exercise: 3 stars, recommended (bag_theorem)  *)
(** Write down an interesting theorem [bag_theorem] about bags
    involving the functions [count] and [add], and prove it.  Note
    that, since this problem is somewhat open-ended, it's possible
    that you may come up with a theorem which is true, but whose proof
    requires techniques you haven't learned yet.  Feel free to ask for
    help if you get stuck! *)

(*
Theorem bag_theorem : ...
Proof.
  ...
Qed.
*)

Theorem my_bag_theorem : forall s : bag, count 0 (add 0 s) = S (count 0 s).
Proof.
  intros s. (* Suppose [s] is a fixed bag. *)
  simpl. (* [simpl] can reduce the left hand side to [S (count 0 s). *)
    reflexivity. (* So both sides of the equation are the same. *)
Qed.
(** [] *)

(* Informal proof:

   Theorem: [forall s : bag, count 0 (add 0 s) = S (count 0 s)].

   Proof: by the definition of [count] and [add] for bags.

   - Suppose [s] is a fixed bag of numbers.

   - Adding a [0] to [s], and then counting the zeros in [s], means that the
     number of [0]s in [s] will be one more than (the successor [S] of) counting
     the [0]s is [s], which is exactly what the other side of the equation says.

   - So both sides of the equation are the same. The theorem is true for [s] by the
     reflexivity of equality.

   - Since we've shown that the theorem holds for an arbitrary [s], we've shown that
     it holds for all [s]s. []

*)

(* ################################################################# *)
(** * Reasoning About Lists *)

(** As with numbers, simple facts about list-processing
    functions can sometimes be proved entirely by simplification.  For
    example, the simplification performed by [reflexivity] is enough
    for this theorem... *)

Theorem nil_app : forall l:natlist,
  [] ++ l = l.
Proof.
  reflexivity. (* [reflexivity] can match the constructors of [++] to simplify this. *)
Qed.

(** ...because the [[]] is substituted into the
    "scrutinee" (the expression whose value is being "scrutinized" by
    the match) in the definition of [app], allowing the match itself
    to be simplified. *)

(** Also, as with numbers, it is sometimes helpful to perform case
    analysis on the possible shapes (empty or non-empty) of an unknown
    list. *)

Theorem tl_length_pred : forall l:natlist,
  pred (length l) = length (tl l).
Proof.
  intros l. (* Suppose [l] is a fixed list. *)
  destruct l as [| n l']. (* Let's consider the possible shapes a list can take. If you look
                             at the constructors for lists, there are two cases. One where
                             [l] is empty [nil], and the other where it [cons]s a number [n]
                             to another list [l']. Let's consider both cases. For the second
                             case, let's call the number [n] and the other list [l']. *)
  - (* Case: [l = nil] *)
    (* We need to show that one less than (i.e., the predecessor of) the length of [[]]
       is the same as the length of the tail of [[]]. *)
    reflexivity. (* The length of [[]] is [0], and the predessor of [0] is [0]. The tail of [[]]
                    is also an empty list [[]], so it's length is [0] too.
                    Both sides of the equation are the same. [reflexivity] can match these
                    cases in the constructors/definitions to simplify. *)
  - (* Case: [l = cons n l'] *)
    (* We need to show that one less than (i.e., the predecessor of) the length of [n :: l']
       is the same as the length of the tail of [n :: l']. *)
    simpl. (* We can simplify out (or "cancel out") the [pred] and [n] on the left side of the
              equation. That makes the left side just [length l']. Similarly, on the right hand
              side, we can take just the tail of [n :: l'], and get the length of that. So the
              right hand side of the equation is als [length l']. *)
    reflexivity. (* Both sides of the equation are the same now. *)
Qed.

(* Informal proof:

   Theorem: [forall l: natlist, pred (length l) = length (tl l)].

   Proof: By case analysis on [l].

   - Suppose [l] is a fixed list of numbers.

   - Let's proceed by case analysis on [l].

     - First, suppose [l] is the empty list [[]].

       - On the left hand side of the equation: then the length of [[]] is [0],
         and the predecessor [pred] of [0] is [0].

       - On the right hand side of the equation: the tail of [[]] is [[]],
         whose length is [0].

       - Since both sides of the equation are the same, the theorem holds in this
         case by the reflexivity of equality.

     - Second, suppose [l] is [cons n l'].

       - On the left hand side of the equation, the predesesor of the length of [n :: l']
         will be the length of [l'].

       - On the right hand side of the equation, the length of the tail of [n :: l']
         will be the length of [l'].

       - Since both sides of the equation are the same, the theorem holds in this
         case by the reflexivity of equality.

   - So the theorem holds for all shapes of [l].

   - Since we've shown that the theorem holds for an arbitrary [l], we've shown that
     it holds for all [l]s. []

 *)

(** Here, the [nil] case works because we've chosen to define
    [tl nil = nil]. Notice that the [as] annotation on the [destruct]
    tactic here introduces two names, [n] and [l'], corresponding to
    the fact that the [cons] constructor for lists takes two
    arguments (the head and tail of the list it is constructing). *)

(** Usually, though, interesting theorems about lists require
    induction for their proofs. *)

(* ----------------------------------------------------------------- *)
(** *** Micro-Sermon *)

(** Simply reading example proof scripts will not get you very far!
    It is important to work through the details of each one, using Coq
    and thinking about what each step achieves.  Otherwise it is more
    or less guaranteed that the exercises will make no sense when you
    get to them.  'Nuff said. *)

(* ================================================================= *)
(** ** Induction on Lists *)

(** Proofs by induction over datatypes like [natlist] are a
    little less familiar than standard natural number induction, but
    the idea is equally simple.  Each [Inductive] declaration defines
    a set of data values that can be built up using the declared
    constructors: a boolean can be either [true] or [false]; a number
    can be either [O] or [S] applied to another number; a list can be
    either [nil] or [cons] applied to a number and a list.

    Moreover, applications of the declared constructors to one another
    are the _only_ possible shapes that elements of an inductively
    defined set can have, and this fact directly gives rise to a way
    of reasoning about inductively defined sets: a number is either
    [O] or else it is [S] applied to some _smaller_ number; a list is
    either [nil] or else it is [cons] applied to some number and some
    _smaller_ list; etc. So, if we have in mind some proposition [P]
    that mentions a list [l] and we want to argue that [P] holds for
    _all_ lists, we can reason as follows:

      - First, show that [P] is true of [l] when [l] is [nil].

      - Then show that [P] is true of [l] when [l] is [cons n l'] for
        some number [n] and some smaller list [l'], assuming that [P]
        is true for [l'].

    Since larger lists can only be built up from smaller ones,
    eventually reaching [nil], these two arguments together establish
    the truth of [P] for all lists [l].  Here's a concrete example: *)

Theorem app_assoc : forall l1 l2 l3 : natlist,
  (l1 ++ l2) ++ l3 = l1 ++ (l2 ++ l3).
Proof.
  intros l1 l2 l3. (* Suppose that [l1], [l2], and [l3] are fixed natural numbers. *)
  induction l1 as [| n l1' IHl1']. (* Let's proceed by case analysis on [l1].
                                      [l1] can have the form [[]], or [n :: l1'].
                                      Also, let's assume that the theorem holds for
                                      [l1']. Let's call that [IHl1']. *)
  - (* Case: [l1 = nil] *)
    (* We need to show that [([] ++ l2) ++ l3 = [] ++ (l2 ++ l3)]. *)
    reflexivity. (* [reflexivity] can remove the empty list from the equation by simplifying it,
                    and then both sides of the equation are the same. *)
  - (* Case [l1 = cons n l1'] *)
    (* We need to show that [((n :: l1') ++ l2) ++ l3 = (n :: l1') ++ l2 ++ l3],
       when [(l1' ++ l2) ++ l3 = l1' ++ l2 ++ l3] (the induction hypothesis. *)
    simpl. (* [simpl] can move the [n] out front. I'm not sure how it does this. *)
    rewrite -> IHl1'. (* But now the induction hypothesis matches par of the left hand side
                         of the equation. So, we can replace the matching part. *)
    reflexivity. (* Now both sides of the equation are the same. *)
Qed.

(* Informal proof:

   Theorem: [forall l1 l2 l3 : natlist, (l1 ++ l2) ++ l3 = l1 ++ (l2 ++ l3)].

   Proof: by inductionon [l1].

   - Suppose [l1], [l2], and [l3] are each a fixed list of numbers.

   - First, consider the case where [l1] = [nil]. We need to show:

       [([] ++ l2) ++ l3 = [] ++ l2 ++ l3].

     - By the definition of [++], appending empty lists to other lists has
       no effect, so we can drop the empty lists. That yields
       [l2 ++ l3 = l2 ++ l3].

     - Then both sides of the equation are the same, so the theorem holds
       for this case, by the reflexivity of equality.

   - Second, consider the case where [l1] is a list with a head element [n]
     and a tail list [l1'], and assume the induction hypothesis:

       [(l1' ++ l2) ++ l3 = l1' ++ l2 ++ l3]

   -  We need to show that:

       [((n :: l1') ++ l2) ++ l3 = (n :: l1') ++ l2 ++ l3]

       - By the definition of [cons], we can move the [n] up front on both sides
         of the equation, which yields:

           [n :: (l1' ++ l2) ++ l3 = n :: l1' ++ l2 ++ l3]

       - The induction hypothesis says [(l1' ++ l2) ++ l3] is the same as
         [l1' ++ l2 ++ l3], so we can replace [l1' ++ l2 ++ l3] with
         [(l1' ++ l2) ++ l3]. That yields:

           [n :: (l1' ++ l2) ++ l3 = n :: (l1' ++ l2) ++ l3]

       - Both sides of the equation are the same, so the theorem holds for
         this case too, by the reflexivity of equality.

   - We've shown that the theorem holds for all shapes that [l1] can take.

   - Since we've shown that the theorem holds for an arbitrary [l1], [l2], and [l3],
     we've shown that the theorem holds for all [l1], [l2], and [l3]. []

*)

(** Notice that, as when doing induction on natural numbers, the
    [as...] clause provided to the [induction] tactic gives a name to
    the induction hypothesis corresponding to the smaller list [l1']
    in the [cons] case. Once again, this Coq proof is not especially
    illuminating as a static written document -- it is easy to see
    what's going on if you are reading the proof in an interactive Coq
    session and you can see the current goal and context at each
    point, but this state is not visible in the written-down parts of
    the Coq proof.  So a natural-language proof -- one written for
    human readers -- will need to include more explicit signposts; in
    particular, it will help the reader stay oriented if we remind
    them exactly what the induction hypothesis is in the second
    case. *)

(** For comparison, here is an informal proof of the same theorem. *)

(** _Theorem_: For all lists [l1], [l2], and [l3],
   [(l1 ++ l2) ++ l3 = l1 ++ (l2 ++ l3)].

   _Proof_: By induction on [l1].

   - First, suppose [l1 = []].  We must show

       ([] ++ l2) ++ l3 = [] ++ (l2 ++ l3),

     which follows directly from the definition of [++].

   - Next, suppose [l1 = n::l1'], with

       (l1' ++ l2) ++ l3 = l1' ++ (l2 ++ l3)

     (the induction hypothesis). We must show

       ((n :: l1') ++ l2) ++ l3 = (n :: l1') ++ (l2 ++ l3).

     By the definition of [++], this follows from

       n :: ((l1' ++ l2) ++ l3) = n :: (l1' ++ (l2 ++ l3)),

     which is immediate from the induction hypothesis.  [] *)

(* ----------------------------------------------------------------- *)
(** *** Reversing a List *)

(** For a slightly more involved example of inductive proof over
    lists, suppose we use [app] to define a list-reversing function
    [rev]: *)

Fixpoint rev (l:natlist) : natlist :=
  match l with
  | nil    => nil (* If [l] is empty, there's nothing to reverse. *)
  | h :: t => rev t ++ [h] (* If [l] has head [h] and a tail [t], reverse the tail [t],
                              then append the head [h] to the end of that. *)
  end.

Example test_rev1:            rev [1;2;3] = [3;2;1].
Proof. reflexivity.  Qed.
Example test_rev2:            rev nil = nil.
Proof. reflexivity.  Qed.

(* ----------------------------------------------------------------- *)
(** *** Properties of [rev] *)

(** Now let's prove some theorems about our newly defined [rev].
    For something a bit more challenging than what we've seen, let's
    prove that reversing a list does not change its length.  Our first
    attempt gets stuck in the successor case... *)

Theorem rev_length_firsttry : forall l : natlist,
  length (rev l) = length l.
Proof.
  intros l. (* Suppose [l] is a fixed list of numbers. *)
  induction l as [| n l' IHl'].
  - (* l = [] *)
    reflexivity.
  - (* l = n :: l' *)
    (* This is the tricky case.  Let's begin as usual
       by simplifying. *)
    simpl.
    (* Now we seem to be stuck: the goal is an equality
       involving [++], but we don't have any useful equations
       in either the immediate context or in the global
       environment!  We can make a little progress by using
       the IH to rewrite the goal... *)
    rewrite <- IHl'.
    (* ... but now we can't go any further. *)
Abort.

(** So let's take the equation relating [++] and [length] that
    would have enabled us to make progress and prove it as a separate
    lemma. *)

Theorem app_length : forall l1 l2 : natlist,
  length (l1 ++ l2) = (length l1) + (length l2).
Proof.
  (* WORKED IN CLASS *)
  intros l1 l2. (* Suppose [l1] and [l2] are each a fixed list of numbers. *)
  induction l1 as [| n l1' IHl1']. (* Let's proceed by induction on [l1]. [l1] can either be an
               empty list [nil], or it can have a head [n] and a tail [l1']. Let's assume (the
               induction hypothesis [IHl1'] that [length (l1' ++ l2) = (length l1) + (length l2)]. *)
  - (* Case: [l1 = nil] *)
    (* We must show that [length ([] ++ l2) = length [] + length l2] *)
    reflexivity. (* [reflexivity] can simplify the [[]] and [length []] cases.
                    And then the equation is the same on both sides. *)
  - (* Case: [l1 = cons n l1'] *)
    (* We must show that [length ((n :: l1') ++ l2) = length (n :: l1') ++ length l2], with an
       induction hypothesis: [length (l1' ++ l2) = length l1' ++ length l2]. *)
    simpl. (* [simpl] can match the [length] case and see that length [n :: l1'] is the same as
              the successor [S] of the length of [l1']. *)
    rewrite -> IHl1'. (* Now we can use the inductive hypothesis to rewrite the left hand side
                         of the equation. *)
    reflexivity. (* And now both sides of the equation are the same. *)
Qed.

(* Informal proof:

   Theorem: [forall l1 l2 : natlist, length (l1 ++ l2) = (length l1) + (length l2)].

   Proof: by induction on [l1].

   - Suppose [l1] and [l2] are fixed lists of numbers.

   - Let's show that the theorem holds for all shapes that [l1] can take (i.e., let's
     prove this by induction). [l1] can take two shapes: it can be an empty list [nil],
     or it can have a head [n] and a tail [l1'].

   - First, consider the case where [l1] is empty.
     We need to show [length ([] ++ l2) = (length []) + (length l2)].

     - By the definition of [++], [[] ++ l2] is the same as [l2], and [length []]
       is [0]. So that yields:

         [length l2 = length l2]

     - Both sides of the equation are the same, so the theorem holds for this case
       by the reflexivity of equality.

   - Second, consider the case where [l1] has a head [n] and a tail [l1'], and suppose
     an induction hypothesis:

       [length (l1' ++ l2) = (length l1') + (length l2)]

     We need to show:

       [length ((n :: l1') ++ l2) = (length (n :: l1')) + (length l2)]

     - By the definition of [length], the length of [n :: l1'] is the same as the
       successor [S] of the length of [l1']. So we can rewrite:

         [S (length (l1' ++ l2)) = S (length l1' + length l2)]

     - The induction hypothesis says that [length (l1' ++ l2)] is the same as
       [length l1' + length l2]. So we can replace the one with the other, which yields:

         [S (length (l1' ++ l2)) = S (length (l1' ++ l2))]

     - Both sides of the equation are the same, so the theorem holds for this case
       by the reflexivity of equality too.

   - We have shown that the theorem holds for all the shapes [l1] can take.

   - Since we have shown that the theorem holds for an arbitrary [l1] and [l2],
     we have shown that it holds for all [l1] and [l2]s. []

*)

(** Note that, to make the lemma as general as possible, we
    quantify over _all_ [natlist]s, not just those that result from an
    application of [rev].  This should seem natural, because the truth
    of the goal clearly doesn't depend on the list having been
    reversed.  Moreover, it is easier to prove the more general
    property. *)

(** Now we can complete the original proof. *)

Theorem rev_length : forall l : natlist,
  length (rev l) = length l.
Proof.
  intros l. induction l as [| n l' IHl'].
  - (* l = nil *)
    reflexivity.
  - (* l = cons *)
    simpl.
    (* rewrite -> app_length. rewrite -> plus_comm. *)
    rewrite -> app_length, plus_comm. (* you can do [rewrite -> app_length], then
                                         [rewrite -> plus_comm], to see the details. *)
    simpl.
    rewrite -> IHl'.
    reflexivity.  Qed.

(** For comparison, here are informal proofs of these two theorems:

    _Theorem_: For all lists [l1] and [l2],
       [length (l1 ++ l2) = length l1 + length l2].

    _Proof_: By induction on [l1].

    - First, suppose [l1 = []].  We must show

        length ([] ++ l2) = length [] + length l2,

      which follows directly from the definitions of
      [length] and [++].

    - Next, suppose [l1 = n::l1'], with

        length (l1' ++ l2) = length l1' + length l2.

      We must show

        length ((n::l1') ++ l2) = length (n::l1') + length l2).

      This follows directly from the definitions of [length] and [++]
      together with the induction hypothesis. [] *)

(** _Theorem_: For all lists [l], [length (rev l) = length l].

    _Proof_: By induction on [l].

      - First, suppose [l = []].  We must show

          length (rev []) = length [],

        which follows directly from the definitions of [length]
        and [rev].

      - Next, suppose [l = n::l'], with

          length (rev l') = length l'.

        We must show

          length (rev (n :: l')) = length (n :: l').

        By the definition of [rev], this follows from

          length ((rev l') ++ [n]) = S (length l')

        which, by the previous lemma, is the same as

          length (rev l') + length [n] = S (length l').

        This follows directly from the induction hypothesis and the
        definition of [length]. [] *)

(** The style of these proofs is rather longwinded and pedantic.
    After the first few, we might find it easier to follow proofs that
    give fewer details (which can easily work out in our own minds or
    on scratch paper if necessary) and just highlight the non-obvious
    steps.  In this more compressed style, the above proof might look
    like this: *)

(** _Theorem_:
     For all lists [l], [length (rev l) = length l].

    _Proof_: First, observe that [length (l ++ [n]) = S (length l)]
     for any [l] (this follows by a straightforward induction on [l]).
     The main property again follows by induction on [l], using the
     observation together with the induction hypothesis in the case
     where [l = n'::l']. [] *)

(** Which style is preferable in a given situation depends on
    the sophistication of the expected audience and how similar the
    proof at hand is to ones that the audience will already be
    familiar with.  The more pedantic style is a good default for our
    present purposes. *)



(* ================================================================= *)
(** ** [Search] *)

(** We've seen that proofs can make use of other theorems we've
    already proved, e.g., using [rewrite].  But in order to refer to a
    theorem, we need to know its name!  Indeed, it is often hard even
    to remember what theorems have been proven, much less what they
    are called.

    Coq's [Search] command is quite helpful with this.  Typing
    [Search foo] will cause Coq to display a list of all theorems
    involving [foo].  For example, try uncommenting the following line
    to see a list of theorems that we have proved about [rev]: *)

(*  Search rev. *)

(** Keep [Search] in mind as you do the following exercises and
    throughout the rest of the book; it can save you a lot of time!

    If you are using ProofGeneral, you can run [Search] with [C-c
    C-a C-a]. Pasting its response into your buffer can be
    accomplished with [C-c C-;]. *)

(* ================================================================= *)
(** ** List Exercises, Part 1 *)

(** **** Exercise: 3 stars (list_exercises)  *)
(** More practice with lists: *)

Theorem app_nil_r : forall l : natlist,
  l ++ [] = l.
Proof.
  intros l. (* Suppose [l] is a fixed list. *)
  induction l as [| n l' IHl']. (* Let's proceed by induction on [l]. *)
  - (* Case: [l = []]. *)
    (* We must show that [[] ++ [] = []]. *)
    reflexivity. (* after simplifying, both sides of the equation are the same. *)
  - (* Case: [l = [n :: l'], with the induction hypothesis: [n :: l' ++ [] = n :: l']. *)
    simpl. (* [simpl] removes the parentheses. Why? *)
    rewrite -> IHl'. (* The induction hypothesis says [l' ++ []] is the same as [l'].
                        So let's replace [l' ++ []] with [l']. *)
    reflexivity. (* Now both sides of the equation are the same. *)
Qed.

(* Informal proof:

   Theorem: [forall l : natlist, l ++ [] = l].

   Proof: by inductiont on [l].

   - Suppose [l] is a fixed list of numbers.

   - Let's proceed by induction on [l].

     - First consider the case where [l] is [[]].
       We must show that [[] ++ [] = []].

       - By the definition of [++], [[] ++ []] is the same as []].

       - Then both sides of the equation are the same.

       - So the theorem holds for this case, by the reflexivity of equality.

     - Now consider the case where [l] has a head [n] and a tail [l1],
       and assume an induction hypothesis:

         [l' ++ [] = l'].

       We must show that [n :: l' ++ [] = n :: l'].

       - The induction hypothesis says that [l' ++ []] is the same as [l'].
         So we can replace [l' ++ []] with [l']. That yields [n :: l' = n :: l'].

       - Both sides of the equation are the same, so this theorem holds
         for this case too, by the reflexivity of equality.

     - We've shown that the theorem holds for all shapes that [l] can take.

   - Since we've shown that the theorem holds for an arbitrary [l],
     we've shown that it holds for all [l]s. []

*)

Theorem rev_app_distr: forall l1 l2 : natlist,
  rev (l1 ++ l2) = rev l2 ++ rev l1.
Proof.
  intros l1 l2. (* Suppose [l1] and [l2] are fixed numbers. *)
  induction l1 as [| n' l1' IHl1']. (* Proceed by induction on [l1]. *)
  - (* Case: [l1 = []]. *)
    (* We must show that [rev ([] ++ l2) = rev l2 ++ rev []]. *)
    simpl. (* By the definition of [++], [simpl] can reduce [[] ++ l2] to [l2] on the left side
              of the equation. By the definition of [rev], it can reduce [rev []] on the right
              side of the equation to []. *)
    rewrite -> app_nil_r. (* By [app_nil_r], [rev l2 ++ []] is the same as [rev l2]. *)
    reflexivity. (* Now both sides of the equation are the same. *)
  - (* Case: [l1 = n' :: l1], with induction hypothesis: [rev (l1' ++ l2) = rev l2 ++ rev l1']. *)
    (* We need to show that [rev ((n' :: l2) ++ l2) = rev l2 ++ rev (n' :: l2)]. *)
    simpl. (* By the definition of [rev], [simpl] can see that [rev n' :: l1'] is the same as
             [rev l1' ++ [n']]. So it does that replacement. *)
    rewrite -> IHl1'. (* The induction hypothesis says that [rev (l1' ++ l2)] is the same as
                         [rev l2 ++ rev l1']. So we can replace the one with the other. *)
    rewrite -> app_assoc. (* Now the only difference between the two sides of the equation is
                             the parentheses. But we have a lemma which says that [++] is
                             associative. So we can rewrite the left side of the equation
                             with different parentheses. *)
    reflexivity. (* Now both sides of the equation are the same. *)
Qed.

(* Informal proof:

   Theorem: [forall l1 l2 : nat, rev (l1 ++ l2) = rev l2 ++ rev l1].

   Proof: by induction on [l1].

   - Suppose [l1] and [l2] are each a fixed list of numbers.

   - Let's proceed by induction on [l1]. That is, let's consider all the shapes that
     [l1] can take.

   - First, consider the case where [l1] is the empty list [[]].
     We must show [rev ([] ++ l2) = rev l2 ++ rev []].

     - By the definition of [++], [[] ++ l2] is the same as [l2]. And by the definition of
       [rev], [rev []] is the same as [[]]. Both of those replacements yield:

         [rev l2 = rev l2 ++ []]

     - By the lemma [app_nil_r], [rev l2 ++ []] is the same as [rev l2].

     - Now both sides of the equation are the same, so the theorem holds for this case
       by the reflexivity of equality.

   - Second, consider the case where [l1] has a head [n'] and a tail [l1'],
     with an induction hypothesis:

       [rev (l1' ++ l2) = rev l2 ++ rev l1'].

     We must show:

       [rev ((n' :: l1') ++ l2) = rev l2 ++ rev (n' :: l1')].

     - By the definition of [rev], [rev (n' :: l1')] is the same as [rev l1' ++ [n']].
       So if we make that replacement, that yields:

         [rev ((l1' ++ [n']) ++ l2) = rev l2 ++ (rev l1' ++ [n'])].

     - Again, [rev ((l1' ++ n') ++ l2)] is the same as [(rev l2 ++ rev l1') ++ [n']].
       So that yields:

         [(rev l2 ++ rev l1') ++ [n'] = rev l2 ++ rev l1' ++ [n']].

     - By the lemma [app_assoc], [++] is associative, so we can arrange the parentheses
       to make the left side of the equation match the right side.

     - Both sides of the equation are the same, so the theorem holds for this case too,
       by the reflexivity of equality.

   - We've shown that the theorem holds for all shapes that [l1] can take.

   - Since we've shown that the theorem holds for an arbitrary [l1], we've shown that
     it holds for all [l1]s. []

*)

Theorem rev_involutive : forall l : natlist,
  rev (rev l) = l.
Proof.
  intros l.
  induction l as [| n l' IHl'].
  - simpl. reflexivity.
  - simpl. rewrite -> rev_app_distr. simpl. rewrite -> IHl'. reflexivity.
Qed.

(** There is a short solution to the next one.  If you find yourself
    getting tangled up, step back and try to look for a simpler
    way. *)

Theorem app_assoc4 : forall l1 l2 l3 l4 : natlist,
  l1 ++ (l2 ++ (l3 ++ l4)) = ((l1 ++ l2) ++ l3) ++ l4.
Proof.
  intros l1 l2 l3 l4.
  induction l1 as [| n1 l1' IHl1'].
  - simpl. rewrite -> app_assoc. reflexivity.
  - simpl. rewrite <- IHl1'. reflexivity.
Qed.

(** An exercise about your implementation of [nonzeros]: *)

Lemma nonzeros_app : forall l1 l2 : natlist,
  nonzeros (l1 ++ l2) = (nonzeros l1) ++ (nonzeros l2).
Proof.
  intros l1 l2.
  induction l1 as [| n1 l1' IHl1'].
  - simpl. reflexivity.
  - induction n1 as [| n1' IHn1'].
    + simpl. rewrite -> IHl1'. reflexivity.
    + simpl. rewrite <- IHl1'. reflexivity.
Qed.
(** [] *)

(** **** Exercise: 2 stars (beq_natlist)  *)
(** Fill in the definition of [beq_natlist], which compares
    lists of numbers for equality.  Prove that [beq_natlist l l]
    yields [true] for every list [l]. *)

Fixpoint beq_natlist (l1 l2 : natlist) : bool :=
  match l1, l2 with
  | nil, nil => true
  | nil, h :: t => false
  | h :: t, nil => false
  | h1 :: t1, h2 :: t2 => match beq_nat h1 h2 with
                          | true => beq_natlist t1 t2
                          | false => false
                          end
  end.

Example test_beq_natlist1 :
  (beq_natlist nil nil = true).
Proof. reflexivity. Qed.

Example test_beq_natlist2 :
  beq_natlist [1;2;3] [1;2;3] = true.
Proof. reflexivity. Qed.

Example test_beq_natlist3 :
  beq_natlist [1;2;3] [1;2;4] = false.
Proof. reflexivity. Qed.

Theorem beq_natlist_refl : forall l:natlist,
  true = beq_natlist l l.
Proof.
  intros l.
  induction l as [| n l' IHl'].
  - reflexivity.
  - destruct n.
    + simpl.
      rewrite -> IHl'.
      reflexivity.
    + simpl.
      rewrite <- beq_nat_refl.
      rewrite -> IHl'.
      reflexivity.
Qed.
(** [] *)

(* ================================================================= *)
(** ** List Exercises, Part 2 *)

(** Here are a couple of little theorems to prove about your
    definitions about bags above. *)

(** **** Exercise: 1 star (count_member_nonzero)  *)
Theorem count_member_nonzero : forall (s : bag),
  leb 1 (count 1 (1 :: s)) = true.
Proof.
  intros s.
  simpl.
  reflexivity.
Qed.
(** [] *)

(** The following lemma about [leb] might help you in the next exercise. *)

Theorem ble_n_Sn : forall n,
  leb n (S n) = true.
Proof.
  intros n. induction n as [| n' IHn'].
  - (* 0 *)
    simpl.  reflexivity.
  - (* S n' *)
    simpl.  rewrite IHn'.  reflexivity.  Qed.

(** **** Exercise: 3 stars, advanced (remove_decreases_count)  *)
Theorem remove_decreases_count: forall (s : bag),
  leb (count 0 (remove_one 0 s)) (count 0 s) = true.
Proof.
  intros s.
  Search count.
  induction s as [| n s' IHs'].
  - simpl. reflexivity.
  - simpl.
    destruct n.
    + simpl. rewrite -> ble_n_Sn. reflexivity.
    + simpl. rewrite -> IHs'. reflexivity.
Qed.
(** [] *)

(** **** Exercise: 3 stars, optional (bag_count_sum)  *)
(** Write down an interesting theorem [bag_count_sum] about bags
    involving the functions [count] and [sum], and prove it using
    Coq.  (You may find that the difficulty of the proof depends on
    how you defined [count]!) *)

Theorem bag_count_sum : forall s1 s2 : bag,
    count 0 s1 + count 0 s2 = count 0 (sum s1 s2).
Proof.
  intros s1 s2. (* Suppose [s1] and [s2] are fixed bags of numbers. *)
  induction s1 as [| n s1' IHs1']. (* Let's proceed by induction on [s1]. *)
  - (* Case: [s1 = []]. *)
    (* We need to show that [count 0 [] + count 0 s2 = count 0 (sum [] s2)]. *)
    simpl. (* By the definition of [count] and [sum], we can drop the empty lists. *)
    reflexivity. (* That renders both sides of the equation the same. *)
  - (* Case: [s1 = [n :: s1'],
       with induction hypothesis: [count 0 s1' + count 0 s2 = count 0 (sum s1' s2)]. *)
    (* We need to show that:
       [count 0 (n :: s1') + count 0 s2 = count 0 (sum (n :: s1') s2)]. *)
    destruct n as [| n']. (* Let's proceed by case analysis on [n]. That is, let's prove the goal
                   holds for each shape of [n]. *)
    + (* Case: [n = 0]. *)
      (* We need to show that:
         [count 0 (0 :: s1') + count 0 s2 = count 0 (sum(0 :: s1') s2)]. *)
      simpl. (* [simpl] can use the definition of [count] and the assumption that [n = 0]
                to figure out that the [count 0] of [n :: sl'] is the successor [S]
                of (count 0 s1'). *)
      rewrite -> IHs1'. (* The induction hypothesis tells us that [count 0 s1' + count 0 s2]
                           is the same as [count 0 (sum s1' s2)]. So we can rewrite. *)
      reflexivity. (* Now both sides of the equation are the same. *)
    + (* Case: [n = S n']. *)
      (* We must show that:
         [(count 0 (S n' :: s1') + count 0 s2 = count 0 (sum (S n' :: s1') s2)]. *)
      simpl. (* [simpl] can see in [S n' :: s1'] that the head of the list [S n'] is not [0].
                So it won't count any [0]s in the head of the list! Because of that, it removes
                the head [S n'] of the list and just considers [s1'] on both sides of the
                equation. *)
      rewrite -> IHs1'. (* But now the equation looks just like the inductive hypothesis.
                           So we can rewrite. *)
      reflexivity. (* Now both sides of the equation both look the same. *)
Qed.
(** [] *)

(** **** Exercise: 4 stars, advanced (rev_injective)  *)
(* Do not modify the following line: *)
Definition manual_grade_for_rev_injective : option (prod nat string) := None.
(** Prove that the [rev] function is injective -- that is,

    forall (l1 l2 : natlist), rev l1 = rev l2 -> l1 = l2.

    (There is a hard way and an easy way to do this.) *)

(* FILL IN HERE *)
(** [] *)

(* ################################################################# *)
(** * Options *)

(** Suppose we want to write a function that returns the [n]th
    element of some list.  If we give it type [nat -> natlist -> nat],
    then we'll have to choose some number to return when the list is
    too short... *)

Fixpoint nth_bad (l:natlist) (n:nat) : nat :=
  match l with
  | nil => 42  (* arbitrary! *)
  | a :: l' => match beq_nat n O with
               | true => a
               | false => nth_bad l' (pred n)
               end
  end.

(** This solution is not so good: If [nth_bad] returns [42], we
    can't tell whether that value actually appears on the input
    without further processing. A better alternative is to change the
    return type of [nth_bad] to include an error value as a possible
    outcome. We call this type [natoption]. *)

Inductive natoption : Type :=
  | Some : nat -> natoption
  | None : natoption.

(** We can then change the above definition of [nth_bad] to
    return [None] when the list is too short and [Some a] when the
    list has enough members and [a] appears at position [n]. We call
    this new function [nth_error] to indicate that it may result in an
    error. *)

Fixpoint nth_error (l:natlist) (n:nat) : natoption :=
  match l with
  | nil => None
  | a :: l' => match beq_nat n O with
               | true => Some a
               | false => nth_error l' (pred n)
               end
  end.

Example test_nth_error1 : nth_error [4;5;6;7] 0 = Some 4.
Proof. reflexivity. Qed.
Example test_nth_error2 : nth_error [4;5;6;7] 3 = Some 7.
Proof. reflexivity. Qed.
Example test_nth_error3 : nth_error [4;5;6;7] 9 = None.
Proof. reflexivity. Qed.

(** (In the HTML version, the boilerplate proofs of these
    examples are elided.  Click on a box if you want to see one.)

    This example is also an opportunity to introduce one more small
    feature of Coq's programming language: conditional
    expressions... *)


Fixpoint nth_error' (l:natlist) (n:nat) : natoption :=
  match l with
  | nil => None
  | a :: l' => if beq_nat n O then Some a
               else nth_error' l' (pred n)
  end.

(** Coq's conditionals are exactly like those found in any other
    language, with one small generalization.  Since the boolean type
    is not built in, Coq actually supports conditional expressions over
    _any_ inductively defined type with exactly two constructors.  The
    guard is considered true if it evaluates to the first constructor
    in the [Inductive] definition and false if it evaluates to the
    second. *)

(** The function below pulls the [nat] out of a [natoption], returning
    a supplied default in the [None] case. *)

Definition option_elim (d : nat) (o : natoption) : nat :=
  match o with
  | Some n' => n'
  | None => d
  end.

(** **** Exercise: 2 stars (hd_error)  *)
(** Using the same idea, fix the [hd] function from earlier so we don't
    have to pass a default element for the [nil] case.  *)

Definition hd_error (l : natlist) : natoption :=
  match l with
  | nil => None
  | h :: t => Some h
  end.

Example test_hd_error1 : hd_error [] = None.
Proof. reflexivity. Qed.

Example test_hd_error2 : hd_error [1] = Some 1.
Proof. reflexivity. Qed.

Example test_hd_error3 : hd_error [5;6] = Some 5.
Proof. reflexivity. Qed.
(** [] *)

(** **** Exercise: 1 star, optional (option_elim_hd)  *)
(** This exercise relates your new [hd_error] to the old [hd]. *)

Theorem option_elim_hd : forall (l:natlist) (default:nat),
  hd default l = option_elim default (hd_error l).
Proof.
  intros l default.
  induction l as [ | h l' IHl' ].
  - reflexivity.
  - reflexivity.
Qed.
(** [] *)

End NatList.

(* ################################################################# *)
(** * Partial Maps *)

(** As a final illustration of how data structures can be defined in
    Coq, here is a simple _partial map_ data type, analogous to the
    map or dictionary data structures found in most programming
    languages. *)

(** First, we define a new inductive datatype [id] to serve as the
    "keys" of our partial maps. *)

Inductive id : Type :=
  | Id : nat -> id.

(** Internally, an [id] is just a number.  Introducing a separate type
    by wrapping each nat with the tag [Id] makes definitions more
    readable and gives us the flexibility to change representations
    later if we wish. *)

(** We'll also need an equality test for [id]s: *)

Definition beq_id (x1 x2 : id) :=
  match x1, x2 with
  | Id n1, Id n2 => beq_nat n1 n2
  end.

(** **** Exercise: 1 star (beq_id_refl)  *)
Theorem beq_id_refl : forall x, true = beq_id x x.
Proof.
  intros x.
  induction x as [n].
  - simpl.
    induction n as [| n' IHn'].
    + reflexivity.
    + simpl. rewrite <- IHn'. reflexivity.
Qed.
(** [] *)

(** Now we define the type of partial maps: *)

Module PartialMap.
Export NatList.

Inductive partial_map : Type :=
  | empty  : partial_map
  | record : id -> nat -> partial_map -> partial_map.

(** This declaration can be read: "There are two ways to construct a
    [partial_map]: either using the constructor [empty] to represent an
    empty partial map, or by applying the constructor [record] to
    a key, a value, and an existing [partial_map] to construct a
    [partial_map] with an additional key-to-value mapping." *)

(** The [update] function overrides the entry for a given key in a
    partial map (or adds a new entry if the given key is not already
    present). *)

Definition update (d : partial_map)
                  (x : id) (value : nat)
                  : partial_map :=
  record x value d.

(** Last, the [find] function searches a [partial_map] for a given
    key.  It returns [None] if the key was not found and [Some val] if
    the key was associated with [val]. If the same key is mapped to
    multiple values, [find] will return the first one it
    encounters. *)

Fixpoint find (x : id) (d : partial_map) : natoption :=
  match d with
  | empty         => None
  | record y v d' => if beq_id x y
                     then Some v
                     else find x d'
  end.


(** **** Exercise: 1 star (update_eq)  *)
Theorem update_eq :
  forall (d : partial_map) (x : id) (v: nat),
    find x (update d x v) = Some v.
Proof.
  intros d x v.
  induction d  as [| x' v' d' IHd' ].
  - simpl. rewrite <- beq_id_refl. reflexivity.
  - simpl. rewrite <- beq_id_refl. reflexivity.
Qed.
(** [] *)

(** **** Exercise: 1 star (update_neq)  *)
Theorem update_neq :
  forall (d : partial_map) (x y : id) (o: nat),
    beq_id x y = false -> find x (update d y o) = find x d.
Proof.
  intros d x y o.
  intros H.
  simpl.
  rewrite -> H.
  reflexivity.
Qed.
(** [] *)
End PartialMap.

(** **** Exercise: 2 stars (baz_num_elts)  *)
(** Consider the following inductive definition: *)

Inductive baz : Type :=
  | Baz1 : baz -> baz
  | Baz2 : baz -> bool -> baz.

(** How _many_ elements does the type [baz] have?
    (Explain your answer in words, preferrably English.) *)

(* I think this type has zero elements, because there is no constructor to create one.
   [Baz1] takes a [baz] as an argument, but where'd we get _that_ [baz]? The same goes
   for [Baz2]. *)
(* Do not modify the following line: *)
Definition manual_grade_for_baz_num_elts : option (prod nat string) := None.
(** [] *)