src/HOL/List.thy
 author haftmann Wed, 17 Feb 2010 16:49:38 +0100 changeset 35195 5163c2d00904 parent 35115 446c5063e4fd child 35208 2b9bce05e84b permissions -rw-r--r--

(*  Title:      HOL/List.thy
Author:     Tobias Nipkow
*)

header {* The datatype of finite lists *}

theory List
uses ("Tools/list_code.ML")
begin

datatype 'a list =
Nil    ("[]")
| Cons 'a  "'a list"    (infixr "#" 65)

syntax
-- {* list Enumeration *}
"_list" :: "args => 'a list"    ("[(_)]")

translations
"[x, xs]" == "x#[xs]"
"[x]" == "x#[]"

subsection {* Basic list processing functions *}

primrec
hd :: "'a list \<Rightarrow> 'a" where
"hd (x # xs) = x"

primrec
tl :: "'a list \<Rightarrow> 'a list" where
"tl [] = []"
| "tl (x # xs) = xs"

primrec
last :: "'a list \<Rightarrow> 'a" where
"last (x # xs) = (if xs = [] then x else last xs)"

primrec
butlast :: "'a list \<Rightarrow> 'a list" where
"butlast []= []"
| "butlast (x # xs) = (if xs = [] then [] else x # butlast xs)"

primrec
set :: "'a list \<Rightarrow> 'a set" where
"set [] = {}"
| "set (x # xs) = insert x (set xs)"

primrec
map :: "('a \<Rightarrow> 'b) \<Rightarrow> 'a list \<Rightarrow> 'b list" where
"map f [] = []"
| "map f (x # xs) = f x # map f xs"

primrec
append :: "'a list \<Rightarrow> 'a list \<Rightarrow> 'a list" (infixr "@" 65) where
append_Nil:"[] @ ys = ys"
| append_Cons: "(x#xs) @ ys = x # xs @ ys"

primrec
rev :: "'a list \<Rightarrow> 'a list" where
"rev [] = []"
| "rev (x # xs) = rev xs @ [x]"

primrec
filter:: "('a \<Rightarrow> bool) \<Rightarrow> 'a list \<Rightarrow> 'a list" where
"filter P [] = []"
| "filter P (x # xs) = (if P x then x # filter P xs else filter P xs)"

syntax
-- {* Special syntax for filter *}
"_filter" :: "[pttrn, 'a list, bool] => 'a list"    ("(1[_<-_./ _])")

translations
"[x<-xs . P]"== "CONST filter (%x. P) xs"

syntax (xsymbols)
"_filter" :: "[pttrn, 'a list, bool] => 'a list"("(1[_\<leftarrow>_ ./ _])")
syntax (HTML output)
"_filter" :: "[pttrn, 'a list, bool] => 'a list"("(1[_\<leftarrow>_ ./ _])")

primrec
foldl :: "('b \<Rightarrow> 'a \<Rightarrow> 'b) \<Rightarrow> 'b \<Rightarrow> 'a list \<Rightarrow> 'b" where
foldl_Nil: "foldl f a [] = a"
| foldl_Cons: "foldl f a (x # xs) = foldl f (f a x) xs"

primrec
foldr :: "('a \<Rightarrow> 'b \<Rightarrow> 'b) \<Rightarrow> 'a list \<Rightarrow> 'b \<Rightarrow> 'b" where
"foldr f [] a = a"
| "foldr f (x # xs) a = f x (foldr f xs a)"

primrec
concat:: "'a list list \<Rightarrow> 'a list" where
"concat [] = []"
| "concat (x # xs) = x @ concat xs"

listsum :: "'a list \<Rightarrow> 'a" where
"listsum [] = 0"
| "listsum (x # xs) = x + listsum xs"

primrec
drop:: "nat \<Rightarrow> 'a list \<Rightarrow> 'a list" where
drop_Nil: "drop n [] = []"
| drop_Cons: "drop n (x # xs) = (case n of 0 \<Rightarrow> x # xs | Suc m \<Rightarrow> drop m xs)"
-- {*Warning: simpset does not contain this definition, but separate
theorems for @{text "n = 0"} and @{text "n = Suc k"} *}

primrec
take:: "nat \<Rightarrow> 'a list \<Rightarrow> 'a list" where
take_Nil:"take n [] = []"
| take_Cons: "take n (x # xs) = (case n of 0 \<Rightarrow> [] | Suc m \<Rightarrow> x # take m xs)"
-- {*Warning: simpset does not contain this definition, but separate
theorems for @{text "n = 0"} and @{text "n = Suc k"} *}

primrec
nth :: "'a list => nat => 'a" (infixl "!" 100) where
nth_Cons: "(x # xs) ! n = (case n of 0 \<Rightarrow> x | Suc k \<Rightarrow> xs ! k)"
-- {*Warning: simpset does not contain this definition, but separate
theorems for @{text "n = 0"} and @{text "n = Suc k"} *}

primrec
list_update :: "'a list \<Rightarrow> nat \<Rightarrow> 'a \<Rightarrow> 'a list" where
"list_update [] i v = []"
| "list_update (x # xs) i v = (case i of 0 \<Rightarrow> v # xs | Suc j \<Rightarrow> x # list_update xs j v)"

nonterminals lupdbinds lupdbind

syntax
"_lupdbind":: "['a, 'a] => lupdbind"    ("(2_ :=/ _)")
"" :: "lupdbind => lupdbinds"    ("_")
"_lupdbinds" :: "[lupdbind, lupdbinds] => lupdbinds"    ("_,/ _")
"_LUpdate" :: "['a, lupdbinds] => 'a"    ("_/[(_)]" [900,0] 900)

translations
"_LUpdate xs (_lupdbinds b bs)" == "_LUpdate (_LUpdate xs b) bs"
"xs[i:=x]" == "CONST list_update xs i x"

primrec
takeWhile :: "('a \<Rightarrow> bool) \<Rightarrow> 'a list \<Rightarrow> 'a list" where
"takeWhile P [] = []"
| "takeWhile P (x # xs) = (if P x then x # takeWhile P xs else [])"

primrec
dropWhile :: "('a \<Rightarrow> bool) \<Rightarrow> 'a list \<Rightarrow> 'a list" where
"dropWhile P [] = []"
| "dropWhile P (x # xs) = (if P x then dropWhile P xs else x # xs)"

primrec
zip :: "'a list \<Rightarrow> 'b list \<Rightarrow> ('a \<times> 'b) list" where
"zip xs [] = []"
| zip_Cons: "zip xs (y # ys) = (case xs of [] => [] | z # zs => (z, y) # zip zs ys)"
-- {*Warning: simpset does not contain this definition, but separate
theorems for @{text "xs = []"} and @{text "xs = z # zs"} *}

primrec
upt :: "nat \<Rightarrow> nat \<Rightarrow> nat list" ("(1[_..</_'])") where
upt_0: "[i..<0] = []"
| upt_Suc: "[i..<(Suc j)] = (if i <= j then [i..<j] @ [j] else [])"

primrec
distinct :: "'a list \<Rightarrow> bool" where
"distinct [] \<longleftrightarrow> True"
| "distinct (x # xs) \<longleftrightarrow> x \<notin> set xs \<and> distinct xs"

primrec
remdups :: "'a list \<Rightarrow> 'a list" where
"remdups [] = []"
| "remdups (x # xs) = (if x \<in> set xs then remdups xs else x # remdups xs)"

definition
insert :: "'a \<Rightarrow> 'a list \<Rightarrow> 'a list" where
"insert x xs = (if x \<in> set xs then xs else x # xs)"

hide (open) const insert hide (open) fact insert_def

primrec
remove1 :: "'a \<Rightarrow> 'a list \<Rightarrow> 'a list" where
"remove1 x [] = []"
| "remove1 x (y # xs) = (if x = y then xs else y # remove1 x xs)"

primrec
removeAll :: "'a \<Rightarrow> 'a list \<Rightarrow> 'a list" where
"removeAll x [] = []"
| "removeAll x (y # xs) = (if x = y then removeAll x xs else y # removeAll x xs)"

primrec
replicate :: "nat \<Rightarrow> 'a \<Rightarrow> 'a list" where
replicate_0: "replicate 0 x = []"
| replicate_Suc: "replicate (Suc n) x = x # replicate n x"

text {*
Function @{text size} is overloaded for all datatypes. Users may
refer to the list version as @{text length}. *}

abbreviation
length :: "'a list \<Rightarrow> nat" where
"length \<equiv> size"

definition
rotate1 :: "'a list \<Rightarrow> 'a list" where
"rotate1 xs = (case xs of [] \<Rightarrow> [] | x#xs \<Rightarrow> xs @ [x])"

definition
rotate :: "nat \<Rightarrow> 'a list \<Rightarrow> 'a list" where
"rotate n = rotate1 ^^ n"

definition
list_all2 :: "('a => 'b => bool) => 'a list => 'b list => bool" where
[code del]: "list_all2 P xs ys =
(length xs = length ys \<and> (\<forall>(x, y) \<in> set (zip xs ys). P x y))"

definition
sublist :: "'a list => nat set => 'a list" where
"sublist xs A = map fst (filter (\<lambda>p. snd p \<in> A) (zip xs [0..<size xs]))"

primrec
splice :: "'a list \<Rightarrow> 'a list \<Rightarrow> 'a list" where
"splice [] ys = ys"
| "splice (x # xs) ys = (if ys = [] then x # xs else x # hd ys # splice xs (tl ys))"
-- {*Warning: simpset does not contain the second eqn but a derived one. *}

text{*
\begin{figure}[htbp]
\fbox{
\begin{tabular}{l}
@{lemma "[a,b]@[c,d] = [a,b,c,d]" by simp}\\
@{lemma "length [a,b,c] = 3" by simp}\\
@{lemma "set [a,b,c] = {a,b,c}" by simp}\\
@{lemma "map f [a,b,c] = [f a, f b, f c]" by simp}\\
@{lemma "rev [a,b,c] = [c,b,a]" by simp}\\
@{lemma "hd [a,b,c,d] = a" by simp}\\
@{lemma "tl [a,b,c,d] = [b,c,d]" by simp}\\
@{lemma "last [a,b,c,d] = d" by simp}\\
@{lemma "butlast [a,b,c,d] = [a,b,c]" by simp}\\
@{lemma[source] "filter (\<lambda>n::nat. n<2) [0,2,1] = [0,1]" by simp}\\
@{lemma "concat [[a,b],[c,d,e],[],[f]] = [a,b,c,d,e,f]" by simp}\\
@{lemma "foldl f x [a,b,c] = f (f (f x a) b) c" by simp}\\
@{lemma "foldr f [a,b,c] x = f a (f b (f c x))" by simp}\\
@{lemma "zip [a,b,c] [x,y,z] = [(a,x),(b,y),(c,z)]" by simp}\\
@{lemma "zip [a,b] [x,y,z] = [(a,x),(b,y)]" by simp}\\
@{lemma "splice [a,b,c] [x,y,z] = [a,x,b,y,c,z]" by simp}\\
@{lemma "splice [a,b,c,d] [x,y] = [a,x,b,y,c,d]" by simp}\\
@{lemma "take 2 [a,b,c,d] = [a,b]" by simp}\\
@{lemma "take 6 [a,b,c,d] = [a,b,c,d]" by simp}\\
@{lemma "drop 2 [a,b,c,d] = [c,d]" by simp}\\
@{lemma "drop 6 [a,b,c,d] = []" by simp}\\
@{lemma "takeWhile (%n::nat. n<3) [1,2,3,0] = [1,2]" by simp}\\
@{lemma "dropWhile (%n::nat. n<3) [1,2,3,0] = [3,0]" by simp}\\
@{lemma "distinct [2,0,1::nat]" by simp}\\
@{lemma "remdups [2,0,2,1::nat,2] = [0,1,2]" by simp}\\
@{lemma "List.insert 2 [0::nat,1,2] = [0,1,2]" by (simp add: List.insert_def)}\\
@{lemma "List.insert 3 [0::nat,1,2] = [3, 0,1,2]" by (simp add: List.insert_def)}\\
@{lemma "remove1 2 [2,0,2,1::nat,2] = [0,2,1,2]" by simp}\\
@{lemma "removeAll 2 [2,0,2,1::nat,2] = [0,1]" by simp}\\
@{lemma "nth [a,b,c,d] 2 = c" by simp}\\
@{lemma "[a,b,c,d][2 := x] = [a,b,x,d]" by simp}\\
@{lemma "sublist [a,b,c,d,e] {0,2,3} = [a,c,d]" by (simp add:sublist_def)}\\
@{lemma "rotate1 [a,b,c,d] = [b,c,d,a]" by (simp add:rotate1_def)}\\
@{lemma "rotate 3 [a,b,c,d] = [d,a,b,c]" by (simp add:rotate1_def rotate_def nat_number)}\\
@{lemma "replicate 4 a = [a,a,a,a]" by (simp add:nat_number)}\\
@{lemma "[2..<5] = [2,3,4]" by (simp add:nat_number)}\\
@{lemma "listsum [1,2,3::nat] = 6" by simp}
\end{tabular}}
\caption{Characteristic examples}
\label{fig:Characteristic}
\end{figure}
Figure~\ref{fig:Characteristic} shows characteristic examples
that should give an intuitive understanding of the above functions.
*}

text{* The following simple sort functions are intended for proofs,
not for efficient implementations. *}

context linorder
begin

fun sorted :: "'a list \<Rightarrow> bool" where
"sorted [] \<longleftrightarrow> True" |
"sorted [x] \<longleftrightarrow> True" |
"sorted (x#y#zs) \<longleftrightarrow> x <= y \<and> sorted (y#zs)"

primrec insort_key :: "('b \<Rightarrow> 'a) \<Rightarrow> 'b \<Rightarrow> 'b list \<Rightarrow> 'b list" where
"insort_key f x [] = [x]" |
"insort_key f x (y#ys) = (if f x \<le> f y then (x#y#ys) else y#(insort_key f x ys))"

definition sort_key :: "('b \<Rightarrow> 'a) \<Rightarrow> 'b list \<Rightarrow> 'b list" where
"sort_key f xs = foldr (insort_key f) xs []"

abbreviation "sort \<equiv> sort_key (\<lambda>x. x)"
abbreviation "insort \<equiv> insort_key (\<lambda>x. x)"

end

subsubsection {* List comprehension *}

text{* Input syntax for Haskell-like list comprehension notation.
Typical example: @{text"[(x,y). x \<leftarrow> xs, y \<leftarrow> ys, x \<noteq> y]"},
the list of all pairs of distinct elements from @{text xs} and @{text ys}.
The syntax is as in Haskell, except that @{text"|"} becomes a dot
(like in Isabelle's set comprehension): @{text"[e. x \<leftarrow> xs, \<dots>]"} rather than
\verb![e| x <- xs, ...]!.

The qualifiers after the dot are
\begin{description}
\item[generators] @{text"p \<leftarrow> xs"},
where @{text p} is a pattern and @{text xs} an expression of list type, or
\item[guards] @{text"b"}, where @{text b} is a boolean expression.
%\item[local bindings] @ {text"let x = e"}.
\end{description}

Just like in Haskell, list comprehension is just a shorthand. To avoid
misunderstandings, the translation into desugared form is not reversed
upon output. Note that the translation of @{text"[e. x \<leftarrow> xs]"} is
optmized to @{term"map (%x. e) xs"}.

It is easy to write short list comprehensions which stand for complex
expressions. During proofs, they may become unreadable (and
mangled). In such cases it can be advisable to introduce separate
definitions for the list comprehensions in question.  *}

(*
Proper theorem proving support would be nice. For example, if
@{text"set[f x y. x \<leftarrow> xs, y \<leftarrow> ys, P x y]"}
produced something like
@{term"{z. EX x: set xs. EX y:set ys. P x y \<and> z = f x y}"}.
*)

nonterminals lc_qual lc_quals

syntax
"_listcompr" :: "'a \<Rightarrow> lc_qual \<Rightarrow> lc_quals \<Rightarrow> 'a list"  ("[_ . __")
"_lc_gen" :: "'a \<Rightarrow> 'a list \<Rightarrow> lc_qual" ("_ <- _")
"_lc_test" :: "bool \<Rightarrow> lc_qual" ("_")
(*"_lc_let" :: "letbinds => lc_qual"  ("let _")*)
"_lc_end" :: "lc_quals" ("]")
"_lc_quals" :: "lc_qual \<Rightarrow> lc_quals \<Rightarrow> lc_quals" (", __")
"_lc_abs" :: "'a => 'b list => 'b list"

(* These are easier than ML code but cannot express the optimized
translation of [e. p<-xs]
translations
"[e. p<-xs]" => "concat(map (_lc_abs p [e]) xs)"
"_listcompr e (_lc_gen p xs) (_lc_quals Q Qs)"
=> "concat (map (_lc_abs p (_listcompr e Q Qs)) xs)"
"[e. P]" => "if P then [e] else []"
"_listcompr e (_lc_test P) (_lc_quals Q Qs)"
=> "if P then (_listcompr e Q Qs) else []"
"_listcompr e (_lc_let b) (_lc_quals Q Qs)"
=> "_Let b (_listcompr e Q Qs)"
*)

syntax (xsymbols)
"_lc_gen" :: "'a \<Rightarrow> 'a list \<Rightarrow> lc_qual" ("_ \<leftarrow> _")
syntax (HTML output)
"_lc_gen" :: "'a \<Rightarrow> 'a list \<Rightarrow> lc_qual" ("_ \<leftarrow> _")

let
val NilC = Syntax.const @{const_name Nil};
val ConsC = Syntax.const @{const_name Cons};
val mapC = Syntax.const @{const_name map};
val concatC = Syntax.const @{const_name concat};
val IfC = Syntax.const @{const_name If};

fun singl x = ConsC $x$ NilC;

fun pat_tr ctxt p e opti = (* %x. case x of p => e | _ => [] *)
let
val x = Free (Name.variant (fold Term.add_free_names [p, e] []) "x", dummyT);
val e = if opti then singl e else e;
val case1 = Syntax.const @{syntax_const "_case1"} $p$ e;
val case2 = Syntax.const @{syntax_const "_case1"} $Syntax.const Term.dummy_patternN$ NilC;
val cs = Syntax.const @{syntax_const "_case2"} $case1$ case2;
val ft = Datatype_Case.case_tr false Datatype.info_of_constr ctxt [x, cs];
in lambda x ft end;

fun abs_tr ctxt (p as Free(s,T)) e opti =
let
val thy = ProofContext.theory_of ctxt;
val s' = Sign.intern_const thy s;
in
if Sign.declared_const thy s'
then (pat_tr ctxt p e opti, false)
else (lambda p e, true)
end
| abs_tr ctxt p e opti = (pat_tr ctxt p e opti, false);

fun lc_tr ctxt [e, Const (@{syntax_const "_lc_test"}, _) $b, qs] = let val res = (case qs of Const (@{syntax_const "_lc_end"}, _) => singl e | Const (@{syntax_const "_lc_quals"}, _)$ q $qs => lc_tr ctxt [e, q, qs]); in IfC$ b $res$ NilC end
| lc_tr ctxt
[e, Const (@{syntax_const "_lc_gen"}, _) $p$ es,
Const(@{syntax_const "_lc_end"}, _)] =
(case abs_tr ctxt p e true of
(f, true) => mapC $f$ es
| (f, false) => concatC $(mapC$ f $es)) | lc_tr ctxt [e, Const (@{syntax_const "_lc_gen"}, _)$ p $es, Const (@{syntax_const "_lc_quals"}, _)$ q $qs] = let val e' = lc_tr ctxt [e, q, qs]; in concatC$ (mapC $(fst (abs_tr ctxt p e' false))$ es) end;

in [(@{syntax_const "_listcompr"}, lc_tr)] end
*}

term "[(x,y,z). b]"
term "[(x,y,z). x\<leftarrow>xs]"
term "[e x y. x\<leftarrow>xs, y\<leftarrow>ys]"
term "[(x,y,z). x<a, x>b]"
term "[(x,y,z). x\<leftarrow>xs, x>b]"
term "[(x,y,z). x<a, x\<leftarrow>xs]"
term "[(x,y). Cons True x \<leftarrow> xs]"
term "[(x,y,z). Cons x [] \<leftarrow> xs]"
term "[(x,y,z). x<a, x>b, x=d]"
term "[(x,y,z). x<a, x>b, y\<leftarrow>ys]"
term "[(x,y,z). x<a, x\<leftarrow>xs,y>b]"
term "[(x,y,z). x<a, x\<leftarrow>xs, y\<leftarrow>ys]"
term "[(x,y,z). x\<leftarrow>xs, x>b, y<a]"
term "[(x,y,z). x\<leftarrow>xs, x>b, y\<leftarrow>ys]"
term "[(x,y,z). x\<leftarrow>xs, y\<leftarrow>ys,y>x]"
term "[(x,y,z). x\<leftarrow>xs, y\<leftarrow>ys,z\<leftarrow>zs]"
(*
term "[(x,y). x\<leftarrow>xs, let xx = x+x, y\<leftarrow>ys, y \<noteq> xx]"
*)

subsubsection {* @{const Nil} and @{const Cons} *}

lemma not_Cons_self [simp]:
"xs \<noteq> x # xs"
by (induct xs) auto

lemmas not_Cons_self2 [simp] = not_Cons_self [symmetric]

lemma neq_Nil_conv: "(xs \<noteq> []) = (\<exists>y ys. xs = y # ys)"
by (induct xs) auto

lemma length_induct:
"(\<And>xs. \<forall>ys. length ys < length xs \<longrightarrow> P ys \<Longrightarrow> P xs) \<Longrightarrow> P xs"
by (rule measure_induct [of length]) iprover

subsubsection {* @{const length} *}

text {*
Needs to come before @{text "@"} because of theorem @{text
append_eq_append_conv}.
*}

lemma length_append [simp]: "length (xs @ ys) = length xs + length ys"
by (induct xs) auto

lemma length_map [simp]: "length (map f xs) = length xs"
by (induct xs) auto

lemma length_rev [simp]: "length (rev xs) = length xs"
by (induct xs) auto

lemma length_tl [simp]: "length (tl xs) = length xs - 1"
by (cases xs) auto

lemma length_0_conv [iff]: "(length xs = 0) = (xs = [])"
by (induct xs) auto

lemma length_greater_0_conv [iff]: "(0 < length xs) = (xs \<noteq> [])"
by (induct xs) auto

lemma length_pos_if_in_set: "x : set xs \<Longrightarrow> length xs > 0"
by auto

lemma length_Suc_conv:
"(length xs = Suc n) = (\<exists>y ys. xs = y # ys \<and> length ys = n)"
by (induct xs) auto

lemma Suc_length_conv:
"(Suc n = length xs) = (\<exists>y ys. xs = y # ys \<and> length ys = n)"
apply (induct xs, simp, simp)
apply blast
done

lemma impossible_Cons: "length xs <= length ys ==> xs = x # ys = False"
by (induct xs) auto

lemma list_induct2 [consumes 1, case_names Nil Cons]:
"length xs = length ys \<Longrightarrow> P [] [] \<Longrightarrow>
(\<And>x xs y ys. length xs = length ys \<Longrightarrow> P xs ys \<Longrightarrow> P (x#xs) (y#ys))
\<Longrightarrow> P xs ys"
proof (induct xs arbitrary: ys)
case Nil then show ?case by simp
next
case (Cons x xs ys) then show ?case by (cases ys) simp_all
qed

lemma list_induct3 [consumes 2, case_names Nil Cons]:
"length xs = length ys \<Longrightarrow> length ys = length zs \<Longrightarrow> P [] [] [] \<Longrightarrow>
(\<And>x xs y ys z zs. length xs = length ys \<Longrightarrow> length ys = length zs \<Longrightarrow> P xs ys zs \<Longrightarrow> P (x#xs) (y#ys) (z#zs))
\<Longrightarrow> P xs ys zs"
proof (induct xs arbitrary: ys zs)
case Nil then show ?case by simp
next
case (Cons x xs ys zs) then show ?case by (cases ys, simp_all)
(cases zs, simp_all)
qed

lemma list_induct2':
"\<lbrakk> P [] [];
\<And>x xs. P (x#xs) [];
\<And>y ys. P [] (y#ys);
\<And>x xs y ys. P xs ys  \<Longrightarrow> P (x#xs) (y#ys) \<rbrakk>
\<Longrightarrow> P xs ys"
by (induct xs arbitrary: ys) (case_tac x, auto)+

lemma neq_if_length_neq: "length xs \<noteq> length ys \<Longrightarrow> (xs = ys) == False"
by (rule Eq_FalseI) auto

simproc_setup list_neq ("(xs::'a list) = ys") = {*
(*
Reduces xs=ys to False if xs and ys cannot be of the same length.
This is the case if the atomic sublists of one are a submultiset
of those of the other list and there are fewer Cons's in one than the other.
*)

let

fun len (Const(@{const_name Nil},_)) acc = acc
| len (Const(@{const_name Cons},_) $_$ xs) (ts,n) = len xs (ts,n+1)
| len (Const(@{const_name append},_) $xs$ ys) acc = len xs (len ys acc)
| len (Const(@{const_name rev},_) $xs) acc = len xs acc | len (Const(@{const_name map},_)$ _ $xs) acc = len xs acc | len t (ts,n) = (t::ts,n); fun list_neq _ ss ct = let val (Const(_,eqT)$ lhs $rhs) = Thm.term_of ct; val (ls,m) = len lhs ([],0) and (rs,n) = len rhs ([],0); fun prove_neq() = let val Type(_,listT::_) = eqT; val size = HOLogic.size_const listT; val eq_len = HOLogic.mk_eq (size$ lhs, size $rhs); val neq_len = HOLogic.mk_Trueprop (HOLogic.Not$ eq_len);
val thm = Goal.prove (Simplifier.the_context ss) [] [] neq_len
(K (simp_tac (Simplifier.inherit_context ss @{simpset}) 1));
in SOME (thm RS @{thm neq_if_length_neq}) end
in
if m < n andalso submultiset (op aconv) (ls,rs) orelse
n < m andalso submultiset (op aconv) (rs,ls)
then prove_neq() else NONE
end;
in list_neq end;
*}

subsubsection {* @{text "@"} -- append *}

lemma append_assoc [simp]: "(xs @ ys) @ zs = xs @ (ys @ zs)"
by (induct xs) auto

lemma append_Nil2 [simp]: "xs @ [] = xs"
by (induct xs) auto

lemma append_is_Nil_conv [iff]: "(xs @ ys = []) = (xs = [] \<and> ys = [])"
by (induct xs) auto

lemma Nil_is_append_conv [iff]: "([] = xs @ ys) = (xs = [] \<and> ys = [])"
by (induct xs) auto

lemma append_self_conv [iff]: "(xs @ ys = xs) = (ys = [])"
by (induct xs) auto

lemma self_append_conv [iff]: "(xs = xs @ ys) = (ys = [])"
by (induct xs) auto

lemma append_eq_append_conv [simp, noatp]:
"length xs = length ys \<or> length us = length vs
==> (xs@us = ys@vs) = (xs=ys \<and> us=vs)"
apply (induct xs arbitrary: ys)
apply (case_tac ys, simp, force)
apply (case_tac ys, force, simp)
done

lemma append_eq_append_conv2: "(xs @ ys = zs @ ts) =
(EX us. xs = zs @ us & us @ ys = ts | xs @ us = zs & ys = us@ ts)"
apply (induct xs arbitrary: ys zs ts)
apply fastsimp
apply(case_tac zs)
apply simp
apply fastsimp
done

lemma same_append_eq [iff, induct_simp]: "(xs @ ys = xs @ zs) = (ys = zs)"
by simp

lemma append1_eq_conv [iff]: "(xs @ [x] = ys @ [y]) = (xs = ys \<and> x = y)"
by simp

lemma append_same_eq [iff, induct_simp]: "(ys @ xs = zs @ xs) = (ys = zs)"
by simp

lemma append_self_conv2 [iff]: "(xs @ ys = ys) = (xs = [])"
using append_same_eq [of _ _ "[]"] by auto

lemma self_append_conv2 [iff]: "(ys = xs @ ys) = (xs = [])"
using append_same_eq [of "[]"] by auto

lemma hd_Cons_tl [simp,noatp]: "xs \<noteq> [] ==> hd xs # tl xs = xs"
by (induct xs) auto

lemma hd_append: "hd (xs @ ys) = (if xs = [] then hd ys else hd xs)"
by (induct xs) auto

lemma hd_append2 [simp]: "xs \<noteq> [] ==> hd (xs @ ys) = hd xs"
by (simp add: hd_append split: list.split)

lemma tl_append: "tl (xs @ ys) = (case xs of [] => tl ys | z#zs => zs @ ys)"
by (simp split: list.split)

lemma tl_append2 [simp]: "xs \<noteq> [] ==> tl (xs @ ys) = tl xs @ ys"
by (simp add: tl_append split: list.split)

lemma Cons_eq_append_conv: "x#xs = ys@zs =
(ys = [] & x#xs = zs | (EX ys'. x#ys' = ys & xs = ys'@zs))"
by(cases ys) auto

lemma append_eq_Cons_conv: "(ys@zs = x#xs) =
(ys = [] & zs = x#xs | (EX ys'. ys = x#ys' & ys'@zs = xs))"
by(cases ys) auto

text {* Trivial rules for solving @{text "@"}-equations automatically. *}

lemma eq_Nil_appendI: "xs = ys ==> xs = [] @ ys"
by simp

lemma Cons_eq_appendI:
"[| x # xs1 = ys; xs = xs1 @ zs |] ==> x # xs = ys @ zs"
by (drule sym) simp

lemma append_eq_appendI:
"[| xs @ xs1 = zs; ys = xs1 @ us |] ==> xs @ ys = zs @ us"
by (drule sym) simp

text {*
Simplification procedure for all list equalities.
Currently only tries to rearrange @{text "@"} to see if
- both lists end in a singleton list,
- or both lists end in the same list.
*}

ML {*
local

fun last (cons as Const(@{const_name Cons},_) $_$ xs) =
(case xs of Const(@{const_name Nil},_) => cons | _ => last xs)
| last (Const(@{const_name append},_) $_$ ys) = last ys
| last t = t;

fun list1 (Const(@{const_name Cons},_) $_$ Const(@{const_name Nil},_)) = true
| list1 _ = false;

fun butlast ((cons as Const(@{const_name Cons},_) $x)$ xs) =
(case xs of Const(@{const_name Nil},_) => xs | _ => cons $butlast xs) | butlast ((app as Const(@{const_name append},_)$ xs) $ys) = app$ butlast ys
| butlast xs = Const(@{const_name Nil},fastype_of xs);

val rearr_ss = HOL_basic_ss addsimps [@{thm append_assoc},
@{thm append_Nil}, @{thm append_Cons}];

fun list_eq ss (F as (eq as Const(_,eqT)) $lhs$ rhs) =
let
val lastl = last lhs and lastr = last rhs;
fun rearr conv =
let
val lhs1 = butlast lhs and rhs1 = butlast rhs;
val Type(_,listT::_) = eqT
val appT = [listT,listT] ---> listT
val app = Const(@{const_name append},appT)
val F2 = eq $(app$lhs1$lastl)$ (app$rhs1$lastr)
val eq = HOLogic.mk_Trueprop (HOLogic.mk_eq (F,F2));
val thm = Goal.prove (Simplifier.the_context ss) [] [] eq
(K (simp_tac (Simplifier.inherit_context ss rearr_ss) 1));
in SOME ((conv RS (thm RS trans)) RS eq_reflection) end;

in
if list1 lastl andalso list1 lastr then rearr @{thm append1_eq_conv}
else if lastl aconv lastr then rearr @{thm append_same_eq}
else NONE
end;

in

val list_eq_simproc =
Simplifier.simproc @{theory} "list_eq" ["(xs::'a list) = ys"] (K list_eq);

end;

*}

subsubsection {* @{text map} *}

lemma map_ext: "(!!x. x : set xs --> f x = g x) ==> map f xs = map g xs"
by (induct xs) simp_all

lemma map_ident [simp]: "map (\<lambda>x. x) = (\<lambda>xs. xs)"
by (rule ext, induct_tac xs) auto

lemma map_append [simp]: "map f (xs @ ys) = map f xs @ map f ys"
by (induct xs) auto

lemma map_map [simp]: "map f (map g xs) = map (f \<circ> g) xs"
by (induct xs) auto

lemma rev_map: "rev (map f xs) = map f (rev xs)"
by (induct xs) auto

lemma map_eq_conv[simp]: "(map f xs = map g xs) = (!x : set xs. f x = g x)"
by (induct xs) auto

lemma map_cong [fundef_cong, recdef_cong]:
"xs = ys ==> (!!x. x : set ys ==> f x = g x) ==> map f xs = map g ys"
-- {* a congruence rule for @{text map} *}
by simp

lemma map_is_Nil_conv [iff]: "(map f xs = []) = (xs = [])"
by (cases xs) auto

lemma Nil_is_map_conv [iff]: "([] = map f xs) = (xs = [])"
by (cases xs) auto

lemma map_eq_Cons_conv:
"(map f xs = y#ys) = (\<exists>z zs. xs = z#zs \<and> f z = y \<and> map f zs = ys)"
by (cases xs) auto

lemma Cons_eq_map_conv:
"(x#xs = map f ys) = (\<exists>z zs. ys = z#zs \<and> x = f z \<and> xs = map f zs)"
by (cases ys) auto

lemmas map_eq_Cons_D = map_eq_Cons_conv [THEN iffD1]
lemmas Cons_eq_map_D = Cons_eq_map_conv [THEN iffD1]
declare map_eq_Cons_D [dest!]  Cons_eq_map_D [dest!]

lemma ex_map_conv:
"(EX xs. ys = map f xs) = (ALL y : set ys. EX x. y = f x)"
by(induct ys, auto simp add: Cons_eq_map_conv)

lemma map_eq_imp_length_eq:
assumes "map f xs = map f ys"
shows "length xs = length ys"
using assms proof (induct ys arbitrary: xs)
case Nil then show ?case by simp
next
case (Cons y ys) then obtain z zs where xs: "xs = z # zs" by auto
from Cons xs have "map f zs = map f ys" by simp
moreover with Cons have "length zs = length ys" by blast
with xs show ?case by simp
qed

lemma map_inj_on:
"[| map f xs = map f ys; inj_on f (set xs Un set ys) |]
==> xs = ys"
apply(frule map_eq_imp_length_eq)
apply(rotate_tac -1)
apply(induct rule:list_induct2)
apply simp
apply(simp)
apply (blast intro:sym)
done

lemma inj_on_map_eq_map:
"inj_on f (set xs Un set ys) \<Longrightarrow> (map f xs = map f ys) = (xs = ys)"
by(blast dest:map_inj_on)

lemma map_injective:
"map f xs = map f ys ==> inj f ==> xs = ys"
by (induct ys arbitrary: xs) (auto dest!:injD)

lemma inj_map_eq_map[simp]: "inj f \<Longrightarrow> (map f xs = map f ys) = (xs = ys)"
by(blast dest:map_injective)

lemma inj_mapI: "inj f ==> inj (map f)"
by (iprover dest: map_injective injD intro: inj_onI)

lemma inj_mapD: "inj (map f) ==> inj f"
apply (unfold inj_on_def, clarify)
apply (erule_tac x = "[x]" in ballE)
apply (erule_tac x = "[y]" in ballE, simp, blast)
apply blast
done

lemma inj_map[iff]: "inj (map f) = inj f"
by (blast dest: inj_mapD intro: inj_mapI)

lemma inj_on_mapI: "inj_on f (\<Union>(set  A)) \<Longrightarrow> inj_on (map f) A"
apply(rule inj_onI)
apply(erule map_inj_on)
apply(blast intro:inj_onI dest:inj_onD)
done

lemma map_idI: "(\<And>x. x \<in> set xs \<Longrightarrow> f x = x) \<Longrightarrow> map f xs = xs"
by (induct xs, auto)

lemma map_fun_upd [simp]: "y \<notin> set xs \<Longrightarrow> map (f(y:=v)) xs = map f xs"
by (induct xs) auto

lemma map_fst_zip[simp]:
"length xs = length ys \<Longrightarrow> map fst (zip xs ys) = xs"
by (induct rule:list_induct2, simp_all)

lemma map_snd_zip[simp]:
"length xs = length ys \<Longrightarrow> map snd (zip xs ys) = ys"
by (induct rule:list_induct2, simp_all)

subsubsection {* @{text rev} *}

lemma rev_append [simp]: "rev (xs @ ys) = rev ys @ rev xs"
by (induct xs) auto

lemma rev_rev_ident [simp]: "rev (rev xs) = xs"
by (induct xs) auto

lemma rev_swap: "(rev xs = ys) = (xs = rev ys)"
by auto

lemma rev_is_Nil_conv [iff]: "(rev xs = []) = (xs = [])"
by (induct xs) auto

lemma Nil_is_rev_conv [iff]: "([] = rev xs) = (xs = [])"
by (induct xs) auto

lemma rev_singleton_conv [simp]: "(rev xs = [x]) = (xs = [x])"
by (cases xs) auto

lemma singleton_rev_conv [simp]: "([x] = rev xs) = (xs = [x])"
by (cases xs) auto

lemma rev_is_rev_conv [iff]: "(rev xs = rev ys) = (xs = ys)"
apply (induct xs arbitrary: ys, force)
apply (case_tac ys, simp, force)
done

lemma inj_on_rev[iff]: "inj_on rev A"

lemma rev_induct [case_names Nil snoc]:
"[| P []; !!x xs. P xs ==> P (xs @ [x]) |] ==> P xs"
apply(simplesubst rev_rev_ident[symmetric])
apply(rule_tac list = "rev xs" in list.induct, simp_all)
done

lemma rev_exhaust [case_names Nil snoc]:
"(xs = [] ==> P) ==>(!!ys y. xs = ys @ [y] ==> P) ==> P"
by (induct xs rule: rev_induct) auto

lemmas rev_cases = rev_exhaust

lemma rev_eq_Cons_iff[iff]: "(rev xs = y#ys) = (xs = rev ys @ [y])"
by(rule rev_cases[of xs]) auto

subsubsection {* @{text set} *}

lemma finite_set [iff]: "finite (set xs)"
by (induct xs) auto

lemma set_append [simp]: "set (xs @ ys) = (set xs \<union> set ys)"
by (induct xs) auto

lemma hd_in_set[simp]: "xs \<noteq> [] \<Longrightarrow> hd xs : set xs"
by(cases xs) auto

lemma set_subset_Cons: "set xs \<subseteq> set (x # xs)"
by auto

lemma set_ConsD: "y \<in> set (x # xs) \<Longrightarrow> y=x \<or> y \<in> set xs"
by auto

lemma set_empty [iff]: "(set xs = {}) = (xs = [])"
by (induct xs) auto

lemma set_empty2[iff]: "({} = set xs) = (xs = [])"
by(induct xs) auto

lemma set_rev [simp]: "set (rev xs) = set xs"
by (induct xs) auto

lemma set_map [simp]: "set (map f xs) = f(set xs)"
by (induct xs) auto

lemma set_filter [simp]: "set (filter P xs) = {x. x : set xs \<and> P x}"
by (induct xs) auto

lemma set_upt [simp]: "set[i..<j] = {i..<j}"
by (induct j) (simp_all add: atLeastLessThanSuc)

lemma split_list: "x : set xs \<Longrightarrow> \<exists>ys zs. xs = ys @ x # zs"
proof (induct xs)
case Nil thus ?case by simp
next
case Cons thus ?case by (auto intro: Cons_eq_appendI)
qed

lemma in_set_conv_decomp: "x \<in> set xs \<longleftrightarrow> (\<exists>ys zs. xs = ys @ x # zs)"
by (auto elim: split_list)

lemma split_list_first: "x : set xs \<Longrightarrow> \<exists>ys zs. xs = ys @ x # zs \<and> x \<notin> set ys"
proof (induct xs)
case Nil thus ?case by simp
next
case (Cons a xs)
show ?case
proof cases
assume "x = a" thus ?case using Cons by fastsimp
next
assume "x \<noteq> a" thus ?case using Cons by(fastsimp intro!: Cons_eq_appendI)
qed
qed

lemma in_set_conv_decomp_first:
"(x : set xs) = (\<exists>ys zs. xs = ys @ x # zs \<and> x \<notin> set ys)"
by (auto dest!: split_list_first)

lemma split_list_last: "x : set xs \<Longrightarrow> \<exists>ys zs. xs = ys @ x # zs \<and> x \<notin> set zs"
proof (induct xs rule:rev_induct)
case Nil thus ?case by simp
next
case (snoc a xs)
show ?case
proof cases
assume "x = a" thus ?case using snoc by simp (metis ex_in_conv set_empty2)
next
assume "x \<noteq> a" thus ?case using snoc by fastsimp
qed
qed

lemma in_set_conv_decomp_last:
"(x : set xs) = (\<exists>ys zs. xs = ys @ x # zs \<and> x \<notin> set zs)"
by (auto dest!: split_list_last)

lemma split_list_prop: "\<exists>x \<in> set xs. P x \<Longrightarrow> \<exists>ys x zs. xs = ys @ x # zs & P x"
proof (induct xs)
case Nil thus ?case by simp
next
case Cons thus ?case
qed

lemma split_list_propE:
assumes "\<exists>x \<in> set xs. P x"
obtains ys x zs where "xs = ys @ x # zs" and "P x"
using split_list_prop [OF assms] by blast

lemma split_list_first_prop:
"\<exists>x \<in> set xs. P x \<Longrightarrow>
\<exists>ys x zs. xs = ys@x#zs \<and> P x \<and> (\<forall>y \<in> set ys. \<not> P y)"
proof (induct xs)
case Nil thus ?case by simp
next
case (Cons x xs)
show ?case
proof cases
assume "P x"
thus ?thesis by simp
(metis Un_upper1 contra_subsetD in_set_conv_decomp_first self_append_conv2 set_append)
next
assume "\<not> P x"
hence "\<exists>x\<in>set xs. P x" using Cons(2) by simp
thus ?thesis using \<not> P x Cons(1) by (metis append_Cons set_ConsD)
qed
qed

lemma split_list_first_propE:
assumes "\<exists>x \<in> set xs. P x"
obtains ys x zs where "xs = ys @ x # zs" and "P x" and "\<forall>y \<in> set ys. \<not> P y"
using split_list_first_prop [OF assms] by blast

lemma split_list_first_prop_iff:
"(\<exists>x \<in> set xs. P x) \<longleftrightarrow>
(\<exists>ys x zs. xs = ys@x#zs \<and> P x \<and> (\<forall>y \<in> set ys. \<not> P y))"
by (rule, erule split_list_first_prop) auto

lemma split_list_last_prop:
"\<exists>x \<in> set xs. P x \<Longrightarrow>
\<exists>ys x zs. xs = ys@x#zs \<and> P x \<and> (\<forall>z \<in> set zs. \<not> P z)"
proof(induct xs rule:rev_induct)
case Nil thus ?case by simp
next
case (snoc x xs)
show ?case
proof cases
assume "P x" thus ?thesis by (metis emptyE set_empty)
next
assume "\<not> P x"
hence "\<exists>x\<in>set xs. P x" using snoc(2) by simp
thus ?thesis using \<not> P x snoc(1) by fastsimp
qed
qed

lemma split_list_last_propE:
assumes "\<exists>x \<in> set xs. P x"
obtains ys x zs where "xs = ys @ x # zs" and "P x" and "\<forall>z \<in> set zs. \<not> P z"
using split_list_last_prop [OF assms] by blast

lemma split_list_last_prop_iff:
"(\<exists>x \<in> set xs. P x) \<longleftrightarrow>
(\<exists>ys x zs. xs = ys@x#zs \<and> P x \<and> (\<forall>z \<in> set zs. \<not> P z))"
by (metis split_list_last_prop [where P=P] in_set_conv_decomp)

lemma finite_list: "finite A ==> EX xs. set xs = A"
by (erule finite_induct)
(auto simp add: set.simps(2) [symmetric] simp del: set.simps(2))

lemma card_length: "card (set xs) \<le> length xs"
by (induct xs) (auto simp add: card_insert_if)

lemma set_minus_filter_out:
"set xs - {y} = set (filter (\<lambda>x. \<not> (x = y)) xs)"
by (induct xs) auto

subsubsection {* @{text filter} *}

lemma filter_append [simp]: "filter P (xs @ ys) = filter P xs @ filter P ys"
by (induct xs) auto

lemma rev_filter: "rev (filter P xs) = filter P (rev xs)"
by (induct xs) simp_all

lemma filter_filter [simp]: "filter P (filter Q xs) = filter (\<lambda>x. Q x \<and> P x) xs"
by (induct xs) auto

lemma length_filter_le [simp]: "length (filter P xs) \<le> length xs"
by (induct xs) (auto simp add: le_SucI)

lemma sum_length_filter_compl:
"length(filter P xs) + length(filter (%x. ~P x) xs) = length xs"
by(induct xs) simp_all

lemma filter_True [simp]: "\<forall>x \<in> set xs. P x ==> filter P xs = xs"
by (induct xs) auto

lemma filter_False [simp]: "\<forall>x \<in> set xs. \<not> P x ==> filter P xs = []"
by (induct xs) auto

lemma filter_empty_conv: "(filter P xs = []) = (\<forall>x\<in>set xs. \<not> P x)"
by (induct xs) simp_all

lemma filter_id_conv: "(filter P xs = xs) = (\<forall>x\<in>set xs. P x)"
apply (induct xs)
apply auto
apply(cut_tac P=P and xs=xs in length_filter_le)
apply simp
done

lemma filter_map:
"filter P (map f xs) = map f (filter (P o f) xs)"
by (induct xs) simp_all

lemma length_filter_map[simp]:
"length (filter P (map f xs)) = length(filter (P o f) xs)"

lemma filter_is_subset [simp]: "set (filter P xs) \<le> set xs"
by auto

lemma length_filter_less:
"\<lbrakk> x : set xs; ~ P x \<rbrakk> \<Longrightarrow> length(filter P xs) < length xs"
proof (induct xs)
case Nil thus ?case by simp
next
case (Cons x xs) thus ?case
apply (auto split:split_if_asm)
using length_filter_le[of P xs] apply arith
done
qed

lemma length_filter_conv_card:
"length(filter p xs) = card{i. i < length xs & p(xs!i)}"
proof (induct xs)
case Nil thus ?case by simp
next
case (Cons x xs)
let ?S = "{i. i < length xs & p(xs!i)}"
have fin: "finite ?S" by(fast intro: bounded_nat_set_is_finite)
show ?case (is "?l = card ?S'")
proof (cases)
assume "p x"
hence eq: "?S' = insert 0 (Suc  ?S)"
by(auto simp: image_def split:nat.split dest:gr0_implies_Suc)
have "length (filter p (x # xs)) = Suc(card ?S)"
using Cons p x by simp
also have "\<dots> = Suc(card(Suc  ?S))" using fin
also have "\<dots> = card ?S'" using eq fin
finally show ?thesis .
next
assume "\<not> p x"
hence eq: "?S' = Suc  ?S"
by(auto simp add: image_def split:nat.split elim:lessE)
have "length (filter p (x # xs)) = card ?S"
using Cons \<not> p x by simp
also have "\<dots> = card(Suc  ?S)" using fin
also have "\<dots> = card ?S'" using eq fin
finally show ?thesis .
qed
qed

lemma Cons_eq_filterD:
"x#xs = filter P ys \<Longrightarrow>
\<exists>us vs. ys = us @ x # vs \<and> (\<forall>u\<in>set us. \<not> P u) \<and> P x \<and> xs = filter P vs"
(is "_ \<Longrightarrow> \<exists>us vs. ?P ys us vs")
proof(induct ys)
case Nil thus ?case by simp
next
case (Cons y ys)
show ?case (is "\<exists>x. ?Q x")
proof cases
assume Py: "P y"
show ?thesis
proof cases
assume "x = y"
with Py Cons.prems have "?Q []" by simp
then show ?thesis ..
next
assume "x \<noteq> y"
with Py Cons.prems show ?thesis by simp
qed
next
assume "\<not> P y"
with Cons obtain us vs where "?P (y#ys) (y#us) vs" by fastsimp
then have "?Q (y#us)" by simp
then show ?thesis ..
qed
qed

lemma filter_eq_ConsD:
"filter P ys = x#xs \<Longrightarrow>
\<exists>us vs. ys = us @ x # vs \<and> (\<forall>u\<in>set us. \<not> P u) \<and> P x \<and> xs = filter P vs"
by(rule Cons_eq_filterD) simp

lemma filter_eq_Cons_iff:
"(filter P ys = x#xs) =
(\<exists>us vs. ys = us @ x # vs \<and> (\<forall>u\<in>set us. \<not> P u) \<and> P x \<and> xs = filter P vs)"
by(auto dest:filter_eq_ConsD)

lemma Cons_eq_filter_iff:
"(x#xs = filter P ys) =
(\<exists>us vs. ys = us @ x # vs \<and> (\<forall>u\<in>set us. \<not> P u) \<and> P x \<and> xs = filter P vs)"
by(auto dest:Cons_eq_filterD)

lemma filter_cong[fundef_cong, recdef_cong]:
"xs = ys \<Longrightarrow> (\<And>x. x \<in> set ys \<Longrightarrow> P x = Q x) \<Longrightarrow> filter P xs = filter Q ys"
apply simp
apply(erule thin_rl)
by (induct ys) simp_all

subsubsection {* List partitioning *}

primrec partition :: "('a \<Rightarrow> bool) \<Rightarrow>'a list \<Rightarrow> 'a list \<times> 'a list" where
"partition P [] = ([], [])"
| "partition P (x # xs) =
(let (yes, no) = partition P xs
in if P x then (x # yes, no) else (yes, x # no))"

lemma partition_filter1:
"fst (partition P xs) = filter P xs"
by (induct xs) (auto simp add: Let_def split_def)

lemma partition_filter2:
"snd (partition P xs) = filter (Not o P) xs"
by (induct xs) (auto simp add: Let_def split_def)

lemma partition_P:
assumes "partition P xs = (yes, no)"
shows "(\<forall>p \<in> set yes.  P p) \<and> (\<forall>p  \<in> set no. \<not> P p)"
proof -
from assms have "yes = fst (partition P xs)" and "no = snd (partition P xs)"
by simp_all
then show ?thesis by (simp_all add: partition_filter1 partition_filter2)
qed

lemma partition_set:
assumes "partition P xs = (yes, no)"
shows "set yes \<union> set no = set xs"
proof -
from assms have "yes = fst (partition P xs)" and "no = snd (partition P xs)"
by simp_all
then show ?thesis by (auto simp add: partition_filter1 partition_filter2)
qed

lemma partition_filter_conv[simp]:
"partition f xs = (filter f xs,filter (Not o f) xs)"
unfolding partition_filter2[symmetric]
unfolding partition_filter1[symmetric] by simp

declare partition.simps[simp del]

subsubsection {* @{text concat} *}

lemma concat_append [simp]: "concat (xs @ ys) = concat xs @ concat ys"
by (induct xs) auto

lemma concat_eq_Nil_conv [simp]: "(concat xss = []) = (\<forall>xs \<in> set xss. xs = [])"
by (induct xss) auto

lemma Nil_eq_concat_conv [simp]: "([] = concat xss) = (\<forall>xs \<in> set xss. xs = [])"
by (induct xss) auto

lemma set_concat [simp]: "set (concat xs) = (UN x:set xs. set x)"
by (induct xs) auto

lemma concat_map_singleton[simp]: "concat(map (%x. [f x]) xs) = map f xs"
by (induct xs) auto

lemma map_concat: "map f (concat xs) = concat (map (map f) xs)"
by (induct xs) auto

lemma filter_concat: "filter p (concat xs) = concat (map (filter p) xs)"
by (induct xs) auto

lemma rev_concat: "rev (concat xs) = concat (map rev (rev xs))"
by (induct xs) auto

subsubsection {* @{text nth} *}

lemma nth_Cons_0 [simp, code]: "(x # xs)!0 = x"
by auto

lemma nth_Cons_Suc [simp, code]: "(x # xs)!(Suc n) = xs!n"
by auto

declare nth.simps [simp del]

lemma nth_append:
"(xs @ ys)!n = (if n < length xs then xs!n else ys!(n - length xs))"
apply (induct xs arbitrary: n, simp)
apply (case_tac n, auto)
done

lemma nth_append_length [simp]: "(xs @ x # ys) ! length xs = x"
by (induct xs) auto

lemma nth_append_length_plus[simp]: "(xs @ ys) ! (length xs + n) = ys ! n"
by (induct xs) auto

lemma nth_map [simp]: "n < length xs ==> (map f xs)!n = f(xs!n)"
apply (induct xs arbitrary: n, simp)
apply (case_tac n, auto)
done

lemma hd_conv_nth: "xs \<noteq> [] \<Longrightarrow> hd xs = xs!0"
by(cases xs) simp_all

lemma list_eq_iff_nth_eq:
"(xs = ys) = (length xs = length ys \<and> (ALL i<length xs. xs!i = ys!i))"
apply(induct xs arbitrary: ys)
apply force
apply(case_tac ys)
apply simp
done

lemma set_conv_nth: "set xs = {xs!i | i. i < length xs}"
apply (induct xs, simp, simp)
apply safe
apply (metis nat_case_0 nth.simps zero_less_Suc)
apply (metis less_Suc_eq_0_disj nth_Cons_Suc)
apply (case_tac i, simp)
apply (metis diff_Suc_Suc nat_case_Suc nth.simps zero_less_diff)
done

lemma in_set_conv_nth: "(x \<in> set xs) = (\<exists>i < length xs. xs!i = x)"
by(auto simp:set_conv_nth)

lemma list_ball_nth: "[| n < length xs; !x : set xs. P x|] ==> P(xs!n)"

lemma nth_mem [simp]: "n < length xs ==> xs!n : set xs"

lemma all_nth_imp_all_set:
"[| !i < length xs. P(xs!i); x : set xs|] ==> P x"

lemma all_set_conv_all_nth:
"(\<forall>x \<in> set xs. P x) = (\<forall>i. i < length xs --> P (xs ! i))"

lemma rev_nth:
"n < size xs \<Longrightarrow> rev xs ! n = xs ! (length xs - Suc n)"
proof (induct xs arbitrary: n)
case Nil thus ?case by simp
next
case (Cons x xs)
hence n: "n < Suc (length xs)" by simp
moreover
{ assume "n < length xs"
with n obtain n' where "length xs - n = Suc n'"
by (cases "length xs - n", auto)
moreover
then have "length xs - Suc n = n'" by simp
ultimately
have "xs ! (length xs - Suc n) = (x # xs) ! (length xs - n)" by simp
}
ultimately
show ?case by (clarsimp simp add: Cons nth_append)
qed

lemma Skolem_list_nth:
"(ALL i<k. EX x. P i x) = (EX xs. size xs = k & (ALL i<k. P i (xs!i)))"
(is "_ = (EX xs. ?P k xs)")
proof(induct k)
case 0 show ?case by simp
next
case (Suc k)
show ?case (is "?L = ?R" is "_ = (EX xs. ?P' xs)")
proof
assume "?R" thus "?L" using Suc by auto
next
assume "?L"
with Suc obtain x xs where "?P k xs & P k x" by (metis less_Suc_eq)
thus "?R" ..
qed
qed

subsubsection {* @{text list_update} *}

lemma length_list_update [simp]: "length(xs[i:=x]) = length xs"
by (induct xs arbitrary: i) (auto split: nat.split)

lemma nth_list_update:
"i < length xs==> (xs[i:=x])!j = (if i = j then x else xs!j)"
by (induct xs arbitrary: i j) (auto simp add: nth_Cons split: nat.split)

lemma nth_list_update_eq [simp]: "i < length xs ==> (xs[i:=x])!i = x"

lemma nth_list_update_neq [simp]: "i \<noteq> j ==> xs[i:=x]!j = xs!j"
by (induct xs arbitrary: i j) (auto simp add: nth_Cons split: nat.split)

lemma list_update_id[simp]: "xs[i := xs!i] = xs"
by (induct xs arbitrary: i) (simp_all split:nat.splits)

lemma list_update_beyond[simp]: "length xs \<le> i \<Longrightarrow> xs[i:=x] = xs"
apply (induct xs arbitrary: i)
apply simp
apply (case_tac i)
apply simp_all
done

lemma list_update_nonempty[simp]: "xs[k:=x] = [] \<longleftrightarrow> xs=[]"
by(metis length_0_conv length_list_update)

lemma list_update_same_conv:
"i < length xs ==> (xs[i := x] = xs) = (xs!i = x)"
by (induct xs arbitrary: i) (auto split: nat.split)

lemma list_update_append1:
"i < size xs \<Longrightarrow> (xs @ ys)[i:=x] = xs[i:=x] @ ys"
apply (induct xs arbitrary: i, simp)
apply(simp split:nat.split)
done

lemma list_update_append:
"(xs @ ys) [n:= x] =
(if n < length xs then xs[n:= x] @ ys else xs @ (ys [n-length xs:= x]))"
by (induct xs arbitrary: n) (auto split:nat.splits)

lemma list_update_length [simp]:
"(xs @ x # ys)[length xs := y] = (xs @ y # ys)"
by (induct xs, auto)

lemma map_update: "map f (xs[k:= y]) = (map f xs)[k := f y]"
by(induct xs arbitrary: k)(auto split:nat.splits)

lemma rev_update:
"k < length xs \<Longrightarrow> rev (xs[k:= y]) = (rev xs)[length xs - k - 1 := y]"
by (induct xs arbitrary: k) (auto simp: list_update_append split:nat.splits)

lemma update_zip:
"(zip xs ys)[i:=xy] = zip (xs[i:=fst xy]) (ys[i:=snd xy])"
by (induct ys arbitrary: i xy xs) (auto, case_tac xs, auto split: nat.split)

lemma set_update_subset_insert: "set(xs[i:=x]) <= insert x (set xs)"
by (induct xs arbitrary: i) (auto split: nat.split)

lemma set_update_subsetI: "[| set xs <= A; x:A |] ==> set(xs[i := x]) <= A"
by (blast dest!: set_update_subset_insert [THEN subsetD])

lemma set_update_memI: "n < length xs \<Longrightarrow> x \<in> set (xs[n := x])"
by (induct xs arbitrary: n) (auto split:nat.splits)

lemma list_update_overwrite[simp]:
"xs [i := x, i := y] = xs [i := y]"
apply (induct xs arbitrary: i) apply simp
apply (case_tac i, simp_all)
done

lemma list_update_swap:
"i \<noteq> i' \<Longrightarrow> xs [i := x, i' := x'] = xs [i' := x', i := x]"
apply (induct xs arbitrary: i i')
apply simp
apply (case_tac i, case_tac i')
apply auto
apply (case_tac i')
apply auto
done

lemma list_update_code [code]:
"[][i := y] = []"
"(x # xs)[0 := y] = y # xs"
"(x # xs)[Suc i := y] = x # xs[i := y]"
by simp_all

subsubsection {* @{text last} and @{text butlast} *}

lemma last_snoc [simp]: "last (xs @ [x]) = x"
by (induct xs) auto

lemma butlast_snoc [simp]: "butlast (xs @ [x]) = xs"
by (induct xs) auto

lemma last_ConsL: "xs = [] \<Longrightarrow> last(x#xs) = x"

lemma last_ConsR: "xs \<noteq> [] \<Longrightarrow> last(x#xs) = last xs"

lemma last_append: "last(xs @ ys) = (if ys = [] then last xs else last ys)"
by (induct xs) (auto)

lemma last_appendL[simp]: "ys = [] \<Longrightarrow> last(xs @ ys) = last xs"

lemma last_appendR[simp]: "ys \<noteq> [] \<Longrightarrow> last(xs @ ys) = last ys"

lemma hd_rev: "xs \<noteq> [] \<Longrightarrow> hd(rev xs) = last xs"
by(rule rev_exhaust[of xs]) simp_all

lemma last_rev: "xs \<noteq> [] \<Longrightarrow> last(rev xs) = hd xs"
by(cases xs) simp_all

lemma last_in_set[simp]: "as \<noteq> [] \<Longrightarrow> last as \<in> set as"
by (induct as) auto

lemma length_butlast [simp]: "length (butlast xs) = length xs - 1"
by (induct xs rule: rev_induct) auto

lemma butlast_append:
"butlast (xs @ ys) = (if ys = [] then butlast xs else xs @ butlast ys)"
by (induct xs arbitrary: ys) auto

lemma append_butlast_last_id [simp]:
"xs \<noteq> [] ==> butlast xs @ [last xs] = xs"
by (induct xs) auto

lemma in_set_butlastD: "x : set (butlast xs) ==> x : set xs"
by (induct xs) (auto split: split_if_asm)

lemma in_set_butlast_appendI:
"x : set (butlast xs) | x : set (butlast ys) ==> x : set (butlast (xs @ ys))"
by (auto dest: in_set_butlastD simp add: butlast_append)

lemma last_drop[simp]: "n < length xs \<Longrightarrow> last (drop n xs) = last xs"
apply (induct xs arbitrary: n)
apply simp
apply (auto split:nat.split)
done

lemma last_conv_nth: "xs\<noteq>[] \<Longrightarrow> last xs = xs!(length xs - 1)"
by(induct xs)(auto simp:neq_Nil_conv)

lemma butlast_conv_take: "butlast xs = take (length xs - 1) xs"
by (induct xs, simp, case_tac xs, simp_all)

lemma last_list_update:
"xs \<noteq> [] \<Longrightarrow> last(xs[k:=x]) = (if k = size xs - 1 then x else last xs)"
by (auto simp: last_conv_nth)

lemma butlast_list_update:
"butlast(xs[k:=x]) =
(if k = size xs - 1 then butlast xs else (butlast xs)[k:=x])"
apply(cases xs rule:rev_cases)
apply simp
done

subsubsection {* @{text take} and @{text drop} *}

lemma take_0 [simp]: "take 0 xs = []"
by (induct xs) auto

lemma drop_0 [simp]: "drop 0 xs = xs"
by (induct xs) auto

lemma take_Suc_Cons [simp]: "take (Suc n) (x # xs) = x # take n xs"
by simp

lemma drop_Suc_Cons [simp]: "drop (Suc n) (x # xs) = drop n xs"
by simp

declare take_Cons [simp del] and drop_Cons [simp del]

lemma take_1_Cons [simp]: "take 1 (x # xs) = [x]"
unfolding One_nat_def by simp

lemma drop_1_Cons [simp]: "drop 1 (x # xs) = xs"
unfolding One_nat_def by simp

lemma take_Suc: "xs ~= [] ==> take (Suc n) xs = hd xs # take n (tl xs)"

lemma drop_Suc: "drop (Suc n) xs = drop n (tl xs)"
by(cases xs, simp_all)

lemma take_tl: "take n (tl xs) = tl (take (Suc n) xs)"
by (induct xs arbitrary: n) simp_all

lemma drop_tl: "drop n (tl xs) = tl(drop n xs)"
by(induct xs arbitrary: n, simp_all add:drop_Cons drop_Suc split:nat.split)

lemma tl_take: "tl (take n xs) = take (n - 1) (tl xs)"
by (cases n, simp, cases xs, auto)

lemma tl_drop: "tl (drop n xs) = drop n (tl xs)"
by (simp only: drop_tl)

lemma nth_via_drop: "drop n xs = y#ys \<Longrightarrow> xs!n = y"
apply (induct xs arbitrary: n, simp)
done

lemma take_Suc_conv_app_nth:
"i < length xs \<Longrightarrow> take (Suc i) xs = take i xs @ [xs!i]"
apply (induct xs arbitrary: i, simp)
apply (case_tac i, auto)
done

lemma drop_Suc_conv_tl:
"i < length xs \<Longrightarrow> (xs!i) # (drop (Suc i) xs) = drop i xs"
apply (induct xs arbitrary: i, simp)
apply (case_tac i, auto)
done

lemma length_take [simp]: "length (take n xs) = min (length xs) n"
by (induct n arbitrary: xs) (auto, case_tac xs, auto)

lemma length_drop [simp]: "length (drop n xs) = (length xs - n)"
by (induct n arbitrary: xs) (auto, case_tac xs, auto)

lemma take_all [simp]: "length xs <= n ==> take n xs = xs"
by (induct n arbitrary: xs) (auto, case_tac xs, auto)

lemma drop_all [simp]: "length xs <= n ==> drop n xs = []"
by (induct n arbitrary: xs) (auto, case_tac xs, auto)

lemma take_append [simp]:
"take n (xs @ ys) = (take n xs @ take (n - length xs) ys)"
by (induct n arbitrary: xs) (auto, case_tac xs, auto)

lemma drop_append [simp]:
"drop n (xs @ ys) = drop n xs @ drop (n - length xs) ys"
by (induct n arbitrary: xs) (auto, case_tac xs, auto)

lemma take_take [simp]: "take n (take m xs) = take (min n m) xs"
apply (induct m arbitrary: xs n, auto)
apply (case_tac xs, auto)
apply (case_tac n, auto)
done

lemma drop_drop [simp]: "drop n (drop m xs) = drop (n + m) xs"
apply (induct m arbitrary: xs, auto)
apply (case_tac xs, auto)
done

lemma take_drop: "take n (drop m xs) = drop m (take (n + m) xs)"
apply (induct m arbitrary: xs n, auto)
apply (case_tac xs, auto)
done

lemma drop_take: "drop n (take m xs) = take (m-n) (drop n xs)"
apply(induct xs arbitrary: m n)
apply simp
done

lemma append_take_drop_id [simp]: "take n xs @ drop n xs = xs"
apply (induct n arbitrary: xs, auto)
apply (case_tac xs, auto)
done

lemma take_eq_Nil[simp]: "(take n xs = []) = (n = 0 \<or> xs = [])"
apply(induct xs arbitrary: n)
apply simp
done

lemma drop_eq_Nil[simp]: "(drop n xs = []) = (length xs <= n)"
apply(induct xs arbitrary: n)
apply simp
done

lemma take_map: "take n (map f xs) = map f (take n xs)"
apply (induct n arbitrary: xs, auto)
apply (case_tac xs, auto)
done

lemma drop_map: "drop n (map f xs) = map f (drop n xs)"
apply (induct n arbitrary: xs, auto)
apply (case_tac xs, auto)
done

lemma rev_take: "rev (take i xs) = drop (length xs - i) (rev xs)"
apply (induct xs arbitrary: i, auto)
apply (case_tac i, auto)
done

lemma rev_drop: "rev (drop i xs) = take (length xs - i) (rev xs)"
apply (induct xs arbitrary: i, auto)
apply (case_tac i, auto)
done

lemma nth_take [simp]: "i < n ==> (take n xs)!i = xs!i"
apply (induct xs arbitrary: i n, auto)
apply (case_tac n, blast)
apply (case_tac i, auto)
done

lemma nth_drop [simp]:
"n + i <= length xs ==> (drop n xs)!i = xs!(n + i)"
apply (induct n arbitrary: xs i, auto)
apply (case_tac xs, auto)
done

lemma butlast_take:
"n <= length xs ==> butlast (take n xs) = take (n - 1) xs"
by (simp add: butlast_conv_take min_max.inf_absorb1 min_max.inf_absorb2)

lemma butlast_drop: "butlast (drop n xs) = drop n (butlast xs)"

lemma take_butlast: "n < length xs ==> take n (butlast xs) = take n xs"

lemma drop_butlast: "drop n (butlast xs) = butlast (drop n xs)"

lemma hd_drop_conv_nth: "\<lbrakk> xs \<noteq> []; n < length xs \<rbrakk> \<Longrightarrow> hd(drop n xs) = xs!n"

lemma set_take_subset: "set(take n xs) \<subseteq> set xs"
by(induct xs arbitrary: n)(auto simp:take_Cons split:nat.split)

lemma set_drop_subset: "set(drop n xs) \<subseteq> set xs"
by(induct xs arbitrary: n)(auto simp:drop_Cons split:nat.split)

lemma in_set_takeD: "x : set(take n xs) \<Longrightarrow> x : set xs"
using set_take_subset by fast

lemma in_set_dropD: "x : set(drop n xs) \<Longrightarrow> x : set xs"
using set_drop_subset by fast

lemma append_eq_conv_conj:
"(xs @ ys = zs) = (xs = take (length xs) zs \<and> ys = drop (length xs) zs)"
apply (induct xs arbitrary: zs, simp, clarsimp)
apply (case_tac zs, auto)
done

"i+j \<le> length(xs) \<Longrightarrow> take (i+j) xs = take i xs @ take j (drop i xs)"
apply (induct xs arbitrary: i, auto)
apply (case_tac i, simp_all)
done

lemma append_eq_append_conv_if:
"(xs\<^isub>1 @ xs\<^isub>2 = ys\<^isub>1 @ ys\<^isub>2) =
(if size xs\<^isub>1 \<le> size ys\<^isub>1
then xs\<^isub>1 = take (size xs\<^isub>1) ys\<^isub>1 \<and> xs\<^isub>2 = drop (size xs\<^isub>1) ys\<^isub>1 @ ys\<^isub>2
else take (size ys\<^isub>1) xs\<^isub>1 = ys\<^isub>1 \<and> drop (size ys\<^isub>1) xs\<^isub>1 @ xs\<^isub>2 = ys\<^isub>2)"
apply(induct xs\<^isub>1 arbitrary: ys\<^isub>1)
apply simp
apply(case_tac ys\<^isub>1)
apply simp_all
done

lemma take_hd_drop:
"n < length xs \<Longrightarrow> take n xs @ [hd (drop n xs)] = take (Suc n) xs"
apply(induct xs arbitrary: n)
apply simp
done

lemma id_take_nth_drop:
"i < length xs \<Longrightarrow> xs = take i xs @ xs!i # drop (Suc i) xs"
proof -
assume si: "i < length xs"
hence "xs = take (Suc i) xs @ drop (Suc i) xs" by auto
moreover
from si have "take (Suc i) xs = take i xs @ [xs!i]"
apply (rule_tac take_Suc_conv_app_nth) by arith
ultimately show ?thesis by auto
qed

lemma upd_conv_take_nth_drop:
"i < length xs \<Longrightarrow> xs[i:=a] = take i xs @ a # drop (Suc i) xs"
proof -
assume i: "i < length xs"
have "xs[i:=a] = (take i xs @ xs!i # drop (Suc i) xs)[i:=a]"
by(rule arg_cong[OF id_take_nth_drop[OF i]])
also have "\<dots> = take i xs @ a # drop (Suc i) xs"
using i by (simp add: list_update_append)
finally show ?thesis .
qed

lemma nth_drop':
"i < length xs \<Longrightarrow> xs ! i # drop (Suc i) xs = drop i xs"
apply (induct i arbitrary: xs)
apply (erule exE)+
apply simp
apply (case_tac xs)
apply simp_all
done

subsubsection {* @{text takeWhile} and @{text dropWhile} *}

lemma length_takeWhile_le: "length (takeWhile P xs) \<le> length xs"
by (induct xs) auto

lemma takeWhile_dropWhile_id [simp]: "takeWhile P xs @ dropWhile P xs = xs"
by (induct xs) auto

lemma takeWhile_append1 [simp]:
"[| x:set xs; ~P(x)|] ==> takeWhile P (xs @ ys) = takeWhile P xs"
by (induct xs) auto

lemma takeWhile_append2 [simp]:
"(!!x. x : set xs ==> P x) ==> takeWhile P (xs @ ys) = xs @ takeWhile P ys"
by (induct xs) auto

lemma takeWhile_tail: "\<not> P x ==> takeWhile P (xs @ (x#l)) = takeWhile P xs"
by (induct xs) auto

lemma takeWhile_nth: "j < length (takeWhile P xs) \<Longrightarrow> takeWhile P xs ! j = xs ! j"
apply (subst (3) takeWhile_dropWhile_id[symmetric]) unfolding nth_append by auto

lemma dropWhile_nth: "j < length (dropWhile P xs) \<Longrightarrow> dropWhile P xs ! j = xs ! (j + length (takeWhile P xs))"
apply (subst (3) takeWhile_dropWhile_id[symmetric]) unfolding nth_append by auto

lemma length_dropWhile_le: "length (dropWhile P xs) \<le> length xs"
by (induct xs) auto

lemma dropWhile_append1 [simp]:
"[| x : set xs; ~P(x)|] ==> dropWhile P (xs @ ys) = (dropWhile P xs)@ys"
by (induct xs) auto

lemma dropWhile_append2 [simp]:
"(!!x. x:set xs ==> P(x)) ==> dropWhile P (xs @ ys) = dropWhile P ys"
by (induct xs) auto

lemma set_takeWhileD: "x : set (takeWhile P xs) ==> x : set xs \<and> P x"
by (induct xs) (auto split: split_if_asm)

lemma takeWhile_eq_all_conv[simp]:
"(takeWhile P xs = xs) = (\<forall>x \<in> set xs. P x)"
by(induct xs, auto)

lemma dropWhile_eq_Nil_conv[simp]:
"(dropWhile P xs = []) = (\<forall>x \<in> set xs. P x)"
by(induct xs, auto)

lemma dropWhile_eq_Cons_conv:
"(dropWhile P xs = y#ys) = (xs = takeWhile P xs @ y # ys & \<not> P y)"
by(induct xs, auto)

lemma distinct_takeWhile[simp]: "distinct xs ==> distinct (takeWhile P xs)"
by (induct xs) (auto dest: set_takeWhileD)

lemma distinct_dropWhile[simp]: "distinct xs ==> distinct (dropWhile P xs)"
by (induct xs) auto

lemma takeWhile_map: "takeWhile P (map f xs) = map f (takeWhile (P \<circ> f) xs)"
by (induct xs) auto

lemma dropWhile_map: "dropWhile P (map f xs) = map f (dropWhile (P \<circ> f) xs)"
by (induct xs) auto

lemma takeWhile_eq_take: "takeWhile P xs = take (length (takeWhile P xs)) xs"
by (induct xs) auto

lemma dropWhile_eq_drop: "dropWhile P xs = drop (length (takeWhile P xs)) xs"
by (induct xs) auto

lemma hd_dropWhile:
"dropWhile P xs \<noteq> [] \<Longrightarrow> \<not> P (hd (dropWhile P xs))"
using assms by (induct xs) auto

lemma takeWhile_eq_filter:
assumes "\<And> x. x \<in> set (dropWhile P xs) \<Longrightarrow> \<not> P x"
shows "takeWhile P xs = filter P xs"
proof -
have A: "filter P xs = filter P (takeWhile P xs @ dropWhile P xs)"
by simp
have B: "filter P (dropWhile P xs) = []"
unfolding filter_empty_conv using assms by blast
have "filter P xs = takeWhile P xs"
unfolding A filter_append B
by (auto simp add: filter_id_conv dest: set_takeWhileD)
thus ?thesis ..
qed

lemma takeWhile_eq_take_P_nth:
"\<lbrakk> \<And> i. \<lbrakk> i < n ; i < length xs \<rbrakk> \<Longrightarrow> P (xs ! i) ; n < length xs \<Longrightarrow> \<not> P (xs ! n) \<rbrakk> \<Longrightarrow>
takeWhile P xs = take n xs"
proof (induct xs arbitrary: n)
case (Cons x xs)
thus ?case
proof (cases n)
case (Suc n') note this[simp]
have "P x" using Cons.prems(1)[of 0] by simp
moreover have "takeWhile P xs = take n' xs"
proof (rule Cons.hyps)
case goal1 thus "P (xs ! i)" using Cons.prems(1)[of "Suc i"] by simp
next case goal2 thus ?case using Cons by auto
qed
ultimately show ?thesis by simp
qed simp
qed simp

lemma nth_length_takeWhile:
"length (takeWhile P xs) < length xs \<Longrightarrow> \<not> P (xs ! length (takeWhile P xs))"
by (induct xs) auto

lemma length_takeWhile_less_P_nth:
assumes all: "\<And> i. i < j \<Longrightarrow> P (xs ! i)" and "j \<le> length xs"
shows "j \<le> length (takeWhile P xs)"
proof (rule classical)
assume "\<not> ?thesis"
hence "length (takeWhile P xs) < length xs" using assms by simp
thus ?thesis using all \<not> ?thesis nth_length_takeWhile[of P xs] by auto
qed

text{* The following two lemmmas could be generalized to an arbitrary
property. *}

lemma takeWhile_neq_rev: "\<lbrakk>distinct xs; x \<in> set xs\<rbrakk> \<Longrightarrow>
takeWhile (\<lambda>y. y \<noteq> x) (rev xs) = rev (tl (dropWhile (\<lambda>y. y \<noteq> x) xs))"
by(induct xs) (auto simp: takeWhile_tail[where l="[]"])

lemma dropWhile_neq_rev: "\<lbrakk>distinct xs; x \<in> set xs\<rbrakk> \<Longrightarrow>
dropWhile (\<lambda>y. y \<noteq> x) (rev xs) = x # rev (takeWhile (\<lambda>y. y \<noteq> x) xs)"
apply(induct xs)
apply simp
apply auto
apply(subst dropWhile_append2)
apply auto
done

lemma takeWhile_not_last:
"\<lbrakk> xs \<noteq> []; distinct xs\<rbrakk> \<Longrightarrow> takeWhile (\<lambda>y. y \<noteq> last xs) xs = butlast xs"
apply(induct xs)
apply simp
apply(case_tac xs)
apply(auto)
done

lemma takeWhile_cong [fundef_cong, recdef_cong]:
"[| l = k; !!x. x : set l ==> P x = Q x |]
==> takeWhile P l = takeWhile Q k"
by (induct k arbitrary: l) (simp_all)

lemma dropWhile_cong [fundef_cong, recdef_cong]:
"[| l = k; !!x. x : set l ==> P x = Q x |]
==> dropWhile P l = dropWhile Q k"
by (induct k arbitrary: l, simp_all)

subsubsection {* @{text zip} *}

lemma zip_Nil [simp]: "zip [] ys = []"
by (induct ys) auto

lemma zip_Cons_Cons [simp]: "zip (x # xs) (y # ys) = (x, y) # zip xs ys"
by simp

declare zip_Cons [simp del]

lemma zip_Cons1:
"zip (x#xs) ys = (case ys of [] \<Rightarrow> [] | y#ys \<Rightarrow> (x,y)#zip xs ys)"
by(auto split:list.split)

lemma length_zip [simp]:
"length (zip xs ys) = min (length xs) (length ys)"
by (induct xs ys rule:list_induct2') auto

lemma zip_obtain_same_length:
assumes "\<And>zs ws n. length zs = length ws \<Longrightarrow> n = min (length xs) (length ys)
\<Longrightarrow> zs = take n xs \<Longrightarrow> ws = take n ys \<Longrightarrow> P (zip zs ws)"
shows "P (zip xs ys)"
proof -
let ?n = "min (length xs) (length ys)"
have "P (zip (take ?n xs) (take ?n ys))"
by (rule assms) simp_all
moreover have "zip xs ys = zip (take ?n xs) (take ?n ys)"
proof (induct xs arbitrary: ys)
case Nil then show ?case by simp
next
case (Cons x xs) then show ?case by (cases ys) simp_all
qed
ultimately show ?thesis by simp
qed

lemma zip_append1:
"zip (xs @ ys) zs =
zip xs (take (length xs) zs) @ zip ys (drop (length xs) zs)"
by (induct xs zs rule:list_induct2') auto

lemma zip_append2:
"zip xs (ys @ zs) =
zip (take (length ys) xs) ys @ zip (drop (length ys) xs) zs"
by (induct xs ys rule:list_induct2') auto

lemma zip_append [simp]:
"[| length xs = length us; length ys = length vs |] ==>
zip (xs@ys) (us@vs) = zip xs us @ zip ys vs"

lemma zip_rev:
"length xs = length ys ==> zip (rev xs) (rev ys) = rev (zip xs ys)"
by (induct rule:list_induct2, simp_all)

lemma zip_map_map:
"zip (map f xs) (map g ys) = map (\<lambda> (x, y). (f x, g y)) (zip xs ys)"
proof (induct xs arbitrary: ys)
case (Cons x xs) note Cons_x_xs = Cons.hyps
show ?case
proof (cases ys)
case (Cons y ys')
show ?thesis unfolding Cons using Cons_x_xs by simp
qed simp
qed simp

lemma zip_map1:
"zip (map f xs) ys = map (\<lambda>(x, y). (f x, y)) (zip xs ys)"
using zip_map_map[of f xs "\<lambda>x. x" ys] by simp

lemma zip_map2:
"zip xs (map f ys) = map (\<lambda>(x, y). (x, f y)) (zip xs ys)"
using zip_map_map[of "\<lambda>x. x" xs f ys] by simp

lemma map_zip_map:
"map f (zip (map g xs) ys) = map (%(x,y). f(g x, y)) (zip xs ys)"
unfolding zip_map1 by auto

lemma map_zip_map2:
"map f (zip xs (map g ys)) = map (%(x,y). f(x, g y)) (zip xs ys)"
unfolding zip_map2 by auto

text{* Courtesy of Andreas Lochbihler: *}
lemma zip_same_conv_map: "zip xs xs = map (\<lambda>x. (x, x)) xs"
by(induct xs) auto

lemma nth_zip [simp]:
"[| i < length xs; i < length ys|] ==> (zip xs ys)!i = (xs!i, ys!i)"
apply (induct ys arbitrary: i xs, simp)
apply (case_tac xs)
apply (simp_all add: nth.simps split: nat.split)
done

lemma set_zip:
"set (zip xs ys) = {(xs!i, ys!i) | i. i < min (length xs) (length ys)}"

lemma zip_same: "((a,b) \<in> set (zip xs xs)) = (a \<in> set xs \<and> a = b)"
by(induct xs) auto

lemma zip_update:
"zip (xs[i:=x]) (ys[i:=y]) = (zip xs ys)[i:=(x,y)]"

lemma zip_replicate [simp]:
"zip (replicate i x) (replicate j y) = replicate (min i j) (x,y)"
apply (induct i arbitrary: j, auto)
apply (case_tac j, auto)
done

lemma take_zip:
"take n (zip xs ys) = zip (take n xs) (take n ys)"
apply (induct n arbitrary: xs ys)
apply simp
apply (case_tac xs, simp)
apply (case_tac ys, simp_all)
done

lemma drop_zip:
"drop n (zip xs ys) = zip (drop n xs) (drop n ys)"
apply (induct n arbitrary: xs ys)
apply simp
apply (case_tac xs, simp)
apply (case_tac ys, simp_all)
done

lemma zip_takeWhile_fst: "zip (takeWhile P xs) ys = takeWhile (P \<circ> fst) (zip xs ys)"
proof (induct xs arbitrary: ys)
case (Cons x xs) thus ?case by (cases ys) auto
qed simp

lemma zip_takeWhile_snd: "zip xs (takeWhile P ys) = takeWhile (P \<circ> snd) (zip xs ys)"
proof (induct xs arbitrary: ys)
case (Cons x xs) thus ?case by (cases ys) auto
qed simp

lemma set_zip_leftD:
"(x,y)\<in> set (zip xs ys) \<Longrightarrow> x \<in> set xs"
by (induct xs ys rule:list_induct2') auto

lemma set_zip_rightD:
"(x,y)\<in> set (zip xs ys) \<Longrightarrow> y \<in> set ys"
by (induct xs ys rule:list_induct2') auto

lemma in_set_zipE:
"(x,y) : set(zip xs ys) \<Longrightarrow> (\<lbrakk> x : set xs; y : set ys \<rbrakk> \<Longrightarrow> R) \<Longrightarrow> R"
by(blast dest: set_zip_leftD set_zip_rightD)

lemma zip_map_fst_snd:
"zip (map fst zs) (map snd zs) = zs"
by (induct zs) simp_all

lemma zip_eq_conv:
"length xs = length ys \<Longrightarrow> zip xs ys = zs \<longleftrightarrow> map fst zs = xs \<and> map snd zs = ys"

lemma distinct_zipI1:
"distinct xs \<Longrightarrow> distinct (zip xs ys)"
proof (induct xs arbitrary: ys)
case (Cons x xs)
show ?case
proof (cases ys)
case (Cons y ys')
have "(x, y) \<notin> set (zip xs ys')"
using Cons.prems by (auto simp: set_zip)
thus ?thesis
unfolding Cons zip_Cons_Cons distinct.simps
using Cons.hyps Cons.prems by simp
qed simp
qed simp

lemma distinct_zipI2:
"distinct xs \<Longrightarrow> distinct (zip xs ys)"
proof (induct xs arbitrary: ys)
case (Cons x xs)
show ?case
proof (cases ys)
case (Cons y ys')
have "(x, y) \<notin> set (zip xs ys')"
using Cons.prems by (auto simp: set_zip)
thus ?thesis
unfolding Cons zip_Cons_Cons distinct.simps
using Cons.hyps Cons.prems by simp
qed simp
qed simp

subsubsection {* @{text list_all2} *}

lemma list_all2_lengthD [intro?]:
"list_all2 P xs ys ==> length xs = length ys"

lemma list_all2_Nil [iff, code]: "list_all2 P [] ys = (ys = [])"

lemma list_all2_Nil2 [iff, code]: "list_all2 P xs [] = (xs = [])"

lemma list_all2_Cons [iff, code]:
"list_all2 P (x # xs) (y # ys) = (P x y \<and> list_all2 P xs ys)"

lemma list_all2_Cons1:
"list_all2 P (x # xs) ys = (\<exists>z zs. ys = z # zs \<and> P x z \<and> list_all2 P xs zs)"
by (cases ys) auto

lemma list_all2_Cons2:
"list_all2 P xs (y # ys) = (\<exists>z zs. xs = z # zs \<and> P z y \<and> list_all2 P zs ys)"
by (cases xs) auto

lemma list_all2_rev [iff]:
"list_all2 P (rev xs) (rev ys) = list_all2 P xs ys"
by (simp add: list_all2_def zip_rev cong: conj_cong)

lemma list_all2_rev1:
"list_all2 P (rev xs) ys = list_all2 P xs (rev ys)"
by (subst list_all2_rev [symmetric]) simp

lemma list_all2_append1:
"list_all2 P (xs @ ys) zs =
(EX us vs. zs = us @ vs \<and> length us = length xs \<and> length vs = length ys \<and>
list_all2 P xs us \<and> list_all2 P ys vs)"
apply (rule iffI)
apply (rule_tac x = "take (length xs) zs" in exI)
apply (rule_tac x = "drop (length xs) zs" in exI)
apply (force split: nat_diff_split simp add: min_def, clarify)
done

lemma list_all2_append2:
"list_all2 P xs (ys @ zs) =
(EX us vs. xs = us @ vs \<and> length us = length ys \<and> length vs = length zs \<and>
list_all2 P us ys \<and> list_all2 P vs zs)"
apply (rule iffI)
apply (rule_tac x = "take (length ys) xs" in exI)
apply (rule_tac x = "drop (length ys) xs" in exI)
apply (force split: nat_diff_split simp add: min_def, clarify)
done

lemma list_all2_append:
"length xs = length ys \<Longrightarrow>
list_all2 P (xs@us) (ys@vs) = (list_all2 P xs ys \<and> list_all2 P us vs)"
by (induct rule:list_induct2, simp_all)

lemma list_all2_appendI [intro?, trans]:
"\<lbrakk> list_all2 P a b; list_all2 P c d \<rbrakk> \<Longrightarrow> list_all2 P (a@c) (b@d)"

lemma list_all2_conv_all_nth:
"list_all2 P xs ys =
(length xs = length ys \<and> (\<forall>i < length xs. P (xs!i) (ys!i)))"
by (force simp add: list_all2_def set_zip)

lemma list_all2_trans:
assumes tr: "!!a b c. P1 a b ==> P2 b c ==> P3 a c"
shows "!!bs cs. list_all2 P1 as bs ==> list_all2 P2 bs cs ==> list_all2 P3 as cs"
(is "!!bs cs. PROP ?Q as bs cs")
proof (induct as)
fix x xs bs assume I1: "!!bs cs. PROP ?Q xs bs cs"
show "!!cs. PROP ?Q (x # xs) bs cs"
proof (induct bs)
fix y ys cs assume I2: "!!cs. PROP ?Q (x # xs) ys cs"
show "PROP ?Q (x # xs) (y # ys) cs"
by (induct cs) (auto intro: tr I1 I2)
qed simp
qed simp

lemma list_all2_all_nthI [intro?]:
"length a = length b \<Longrightarrow> (\<And>n. n < length a \<Longrightarrow> P (a!n) (b!n)) \<Longrightarrow> list_all2 P a b"

lemma list_all2I:
"\<forall>x \<in> set (zip a b). split P x \<Longrightarrow> length a = length b \<Longrightarrow> list_all2 P a b"

lemma list_all2_nthD:
"\<lbrakk> list_all2 P xs ys; p < size xs \<rbrakk> \<Longrightarrow> P (xs!p) (ys!p)"

lemma list_all2_nthD2:
"\<lbrakk>list_all2 P xs ys; p < size ys\<rbrakk> \<Longrightarrow> P (xs!p) (ys!p)"
by (frule list_all2_lengthD) (auto intro: list_all2_nthD)

lemma list_all2_map1:
"list_all2 P (map f as) bs = list_all2 (\<lambda>x y. P (f x) y) as bs"

lemma list_all2_map2:
"list_all2 P as (map f bs) = list_all2 (\<lambda>x y. P x (f y)) as bs"

lemma list_all2_refl [intro?]:
"(\<And>x. P x x) \<Longrightarrow> list_all2 P xs xs"

lemma list_all2_update_cong:
"\<lbrakk> i<size xs; list_all2 P xs ys; P x y \<rbrakk> \<Longrightarrow> list_all2 P (xs[i:=x]) (ys[i:=y])"

lemma list_all2_update_cong2:
"\<lbrakk>list_all2 P xs ys; P x y; i < length ys\<rbrakk> \<Longrightarrow> list_all2 P (xs[i:=x]) (ys[i:=y])"

lemma list_all2_takeI [simp,intro?]:
"list_all2 P xs ys \<Longrightarrow> list_all2 P (take n xs) (take n ys)"
apply (induct xs arbitrary: n ys)
apply simp
apply (case_tac n)
apply auto
done

lemma list_all2_dropI [simp,intro?]:
"list_all2 P as bs \<Longrightarrow> list_all2 P (drop n as) (drop n bs)"
apply (induct as arbitrary: n bs, simp)
apply (case_tac n, simp, simp)
done

lemma list_all2_mono [intro?]:
"list_all2 P xs ys \<Longrightarrow> (\<And>xs ys. P xs ys \<Longrightarrow> Q xs ys) \<Longrightarrow> list_all2 Q xs ys"
apply (induct xs arbitrary: ys, simp)
apply (case_tac ys, auto)
done

lemma list_all2_eq:
"xs = ys \<longleftrightarrow> list_all2 (op =) xs ys"
by (induct xs ys rule: list_induct2') auto

subsubsection {* @{text foldl} and @{text foldr} *}

lemma foldl_append [simp]:
"foldl f a (xs @ ys) = foldl f (foldl f a xs) ys"
by (induct xs arbitrary: a) auto

lemma foldr_append[simp]: "foldr f (xs @ ys) a = foldr f xs (foldr f ys a)"
by (induct xs) auto

lemma foldr_map: "foldr g (map f xs) a = foldr (g o f) xs a"
by(induct xs) simp_all

text{* For efficient code generation: avoid intermediate list. *}
lemma foldl_map[code_unfold]:
"foldl g a (map f xs) = foldl (%a x. g a (f x)) a xs"
by(induct xs arbitrary:a) simp_all

lemma foldl_apply:
assumes "\<And>x. x \<in> set xs \<Longrightarrow> f x \<circ> h = h \<circ> g x"
shows "foldl (\<lambda>s x. f x s) (h s) xs = h (foldl (\<lambda>s x. g x s) s xs)"
by (rule sym, insert assms, induct xs arbitrary: s) (simp_all add: expand_fun_eq)

lemma foldl_cong [fundef_cong, recdef_cong]:
"[| a = b; l = k; !!a x. x : set l ==> f a x = g a x |]
==> foldl f a l = foldl g b k"
by (induct k arbitrary: a b l) simp_all

lemma foldr_cong [fundef_cong, recdef_cong]:
"[| a = b; l = k; !!a x. x : set l ==> f x a = g x a |]
==> foldr f l a = foldr g k b"
by (induct k arbitrary: a b l) simp_all

lemma foldl_fun_comm:
assumes "\<And>x y s. f (f s x) y = f (f s y) x"
shows "f (foldl f s xs) x = foldl f (f s x) xs"
by (induct xs arbitrary: s)

shows "foldl op+ (x+y) zs = x + (foldl op+ y zs)"

shows "x + (foldl op+ 0 zs) = foldl op+ x zs"

lemma foldl_rev:
assumes "\<And>x y s. f (f s x) y = f (f s y) x"
shows "foldl f s (rev xs) = foldl f s xs"
proof (induct xs arbitrary: s)
case Nil then show ?case by simp
next
case (Cons x xs) with assms show ?case by (simp add: foldl_fun_comm)
qed

text{* The First Duality Theorem'' in Bird \& Wadler: *}

lemma foldl_foldr1_lemma:
"foldl op + a xs = a + foldr op + xs (0\<Colon>'a::monoid_add)"
by (induct xs arbitrary: a) (auto simp:add_assoc)

corollary foldl_foldr1:
"foldl op + 0 xs = foldr op + xs (0\<Colon>'a::monoid_add)"

text{* The Third Duality Theorem'' in Bird \& Wadler: *}

lemma foldr_foldl: "foldr f xs a = foldl (%x y. f y x) a (rev xs)"
by (induct xs) auto

lemma foldl_foldr: "foldl f a xs = foldr (%x y. f y x) (rev xs) a"
by (simp add: foldr_foldl [of "%x y. f y x" "rev xs"])

lemma (in ab_semigroup_add) foldr_conv_foldl: "foldr op + xs a = foldl op + a xs"

text {*
Note: @{text "n \<le> foldl (op +) n ns"} looks simpler, but is more
difficult to use because it requires an additional transitivity step.
*}

lemma start_le_sum: "(m::nat) <= n ==> m <= foldl (op +) n ns"
by (induct ns arbitrary: n) auto

lemma elem_le_sum: "(n::nat) : set ns ==> n <= foldl (op +) 0 ns"
by (force intro: start_le_sum simp add: in_set_conv_decomp)

lemma sum_eq_0_conv [iff]:
"(foldl (op +) (m::nat) ns = 0) = (m = 0 \<and> (\<forall>n \<in> set ns. n = 0))"
by (induct ns arbitrary: m) auto

lemma foldr_invariant:
"\<lbrakk>Q x ; \<forall> x\<in> set xs. P x; \<forall> x y. P x \<and> Q y \<longrightarrow> Q (f x y) \<rbrakk> \<Longrightarrow> Q (foldr f xs x)"
by (induct xs, simp_all)

lemma foldl_invariant:
"\<lbrakk>Q x ; \<forall> x\<in> set xs. P x; \<forall> x y. P x \<and> Q y \<longrightarrow> Q (f y x) \<rbrakk> \<Longrightarrow> Q (foldl f x xs)"
by (induct xs arbitrary: x, simp_all)

lemma foldl_weak_invariant:
assumes "P s"
and "\<And>s x. x \<in> set xs \<Longrightarrow> P s \<Longrightarrow> P (f s x)"
shows "P (foldl f s xs)"
using assms by (induct xs arbitrary: s) simp_all

text {* @{const foldl} and @{const concat} *}

lemma foldl_conv_concat:
"foldl (op @) xs xss = xs @ concat xss"
proof (induct xss arbitrary: xs)
case Nil show ?case by simp
next
interpret monoid_add "[]" "op @" proof qed simp_all
case Cons then show ?case by (simp add: foldl_absorb0)
qed

lemma concat_conv_foldl: "concat xss = foldl (op @) [] xss"

text {* @{const Finite_Set.fold} and @{const foldl} *}

lemma (in fun_left_comm) fold_set_remdups:
"fold f y (set xs) = foldl (\<lambda>y x. f x y) y (remdups xs)"
by (rule sym, induct xs arbitrary: y) (simp_all add: fold_fun_comm insert_absorb)

lemma (in fun_left_comm_idem) fold_set:
"fold f y (set xs) = foldl (\<lambda>y x. f x y) y xs"
by (rule sym, induct xs arbitrary: y) (simp_all add: fold_fun_comm)

lemma (in ab_semigroup_idem_mult) fold1_set:
assumes "xs \<noteq> []"
shows "fold1 times (set xs) = foldl times (hd xs) (tl xs)"
proof -
interpret fun_left_comm_idem times by (fact fun_left_comm_idem)
from assms obtain y ys where xs: "xs = y # ys"
by (cases xs) auto
show ?thesis
proof (cases "set ys = {}")
case True with xs show ?thesis by simp
next
case False
then have "fold1 times (insert y (set ys)) = fold times y (set ys)"
by (simp only: finite_set fold1_eq_fold_idem)
with xs show ?thesis by (simp add: fold_set mult_commute)
qed
qed

lemma (in lattice) Inf_fin_set_fold [code_unfold]:
"Inf_fin (set (x # xs)) = foldl inf x xs"
proof -
interpret ab_semigroup_idem_mult "inf :: 'a \<Rightarrow> 'a \<Rightarrow> 'a"
by (fact ab_semigroup_idem_mult_inf)
show ?thesis
by (simp add: Inf_fin_def fold1_set del: set.simps)
qed

lemma (in lattice) Sup_fin_set_fold [code_unfold]:
"Sup_fin (set (x # xs)) = foldl sup x xs"
proof -
interpret ab_semigroup_idem_mult "sup :: 'a \<Rightarrow> 'a \<Rightarrow> 'a"
by (fact ab_semigroup_idem_mult_sup)
show ?thesis
by (simp add: Sup_fin_def fold1_set del: set.simps)
qed

lemma (in linorder) Min_fin_set_fold [code_unfold]:
"Min (set (x # xs)) = foldl min x xs"
proof -
interpret ab_semigroup_idem_mult "min :: 'a \<Rightarrow> 'a \<Rightarrow> 'a"
by (fact ab_semigroup_idem_mult_min)
show ?thesis
by (simp add: Min_def fold1_set del: set.simps)
qed

lemma (in linorder) Max_fin_set_fold [code_unfold]:
"Max (set (x # xs)) = foldl max x xs"
proof -
interpret ab_semigroup_idem_mult "max :: 'a \<Rightarrow> 'a \<Rightarrow> 'a"
by (fact ab_semigroup_idem_mult_max)
show ?thesis
by (simp add: Max_def fold1_set del: set.simps)
qed

lemma (in complete_lattice) Inf_set_fold [code_unfold]:
"Inf (set xs) = foldl inf top xs"
proof -
interpret fun_left_comm_idem "inf :: 'a \<Rightarrow> 'a \<Rightarrow> 'a"
by (fact fun_left_comm_idem_inf)
show ?thesis by (simp add: Inf_fold_inf fold_set inf_commute)
qed

lemma (in complete_lattice) Sup_set_fold [code_unfold]:
"Sup (set xs) = foldl sup bot xs"
proof -
interpret fun_left_comm_idem "sup :: 'a \<Rightarrow> 'a \<Rightarrow> 'a"
by (fact fun_left_comm_idem_sup)
show ?thesis by (simp add: Sup_fold_sup fold_set sup_commute)
qed

lemma (in complete_lattice) INFI_set_fold:
"INFI (set xs) f = foldl (\<lambda>y x. inf (f x) y) top xs"
unfolding INFI_def set_map [symmetric] Inf_set_fold foldl_map

lemma (in complete_lattice) SUPR_set_fold:
"SUPR (set xs) f = foldl (\<lambda>y x. sup (f x) y) bot xs"
unfolding SUPR_def set_map [symmetric] Sup_set_fold foldl_map

subsubsection {* List summation: @{const listsum} and @{text"\<Sum>"}*}

lemma listsum_append [simp]: "listsum (xs @ ys) = listsum xs + listsum ys"

lemma listsum_rev [simp]:
shows "listsum (rev xs) = listsum xs"

lemma listsum_map_remove1:
fixes f :: "'a \<Rightarrow> ('b::comm_monoid_add)"
shows "x : set xs \<Longrightarrow> listsum(map f xs) = f x + listsum(map f (remove1 x xs))"

lemma list_size_conv_listsum:
"list_size f xs = listsum (map f xs) + size xs"
by(induct xs) auto

lemma listsum_foldr: "listsum xs = foldr (op +) xs 0"
by (induct xs) auto

lemma length_concat: "length (concat xss) = listsum (map length xss)"
by (induct xss) simp_all

lemma listsum_map_filter:
fixes f :: "'a \<Rightarrow> 'b \<Colon> comm_monoid_add"
assumes "\<And> x. \<lbrakk> x \<in> set xs ; \<not> P x \<rbrakk> \<Longrightarrow> f x = 0"
shows "listsum (map f (filter P xs)) = listsum (map f xs)"
using assms by (induct xs) auto

text{* For efficient code generation ---
@{const listsum} is not tail recursive but @{const foldl} is. *}
lemma listsum[code_unfold]: "listsum xs = foldl (op +) 0 xs"

lemma distinct_listsum_conv_Setsum:
"distinct xs \<Longrightarrow> listsum xs = Setsum(set xs)"
by (induct xs) simp_all

text{* Some syntactic sugar for summing a function over a list: *}

syntax
"_listsum" :: "pttrn => 'a list => 'b => 'b"    ("(3SUM _<-_. _)" [0, 51, 10] 10)
syntax (xsymbols)
"_listsum" :: "pttrn => 'a list => 'b => 'b"    ("(3\<Sum>_\<leftarrow>_. _)" [0, 51, 10] 10)
syntax (HTML output)
"_listsum" :: "pttrn => 'a list => 'b => 'b"    ("(3\<Sum>_\<leftarrow>_. _)" [0, 51, 10] 10)

translations -- {* Beware of argument permutation! *}
"SUM x<-xs. b" == "CONST listsum (CONST map (%x. b) xs)"
"\<Sum>x\<leftarrow>xs. b" == "CONST listsum (CONST map (%x. b) xs)"

lemma listsum_triv: "(\<Sum>x\<leftarrow>xs. r) = of_nat (length xs) * r"
by (induct xs) (simp_all add: left_distrib)

lemma listsum_0 [simp]: "(\<Sum>x\<leftarrow>xs. 0) = 0"
by (induct xs) (simp_all add: left_distrib)

text{* For non-Abelian groups @{text xs} needs to be reversed on one side: *}
lemma uminus_listsum_map:
fixes f :: "'a \<Rightarrow> 'b\<Colon>ab_group_add"
shows "- listsum (map f xs) = (listsum (map (uminus o f) xs))"
by (induct xs) simp_all

fixes f g :: "'a \<Rightarrow> 'b::comm_monoid_add"
shows "(\<Sum>x\<leftarrow>xs. f x + g x) = listsum (map f xs) + listsum (map g xs)"
by (induct xs) (simp_all add: algebra_simps)

lemma listsum_subtractf:
fixes f g :: "'a \<Rightarrow> 'b::ab_group_add"
shows "(\<Sum>x\<leftarrow>xs. f x - g x) = listsum (map f xs) - listsum (map g xs)"
by (induct xs) simp_all

lemma listsum_const_mult:
fixes f :: "'a \<Rightarrow> 'b::semiring_0"
shows "(\<Sum>x\<leftarrow>xs. c * f x) = c * (\<Sum>x\<leftarrow>xs. f x)"
by (induct xs, simp_all add: algebra_simps)

lemma listsum_mult_const:
fixes f :: "'a \<Rightarrow> 'b::semiring_0"
shows "(\<Sum>x\<leftarrow>xs. f x * c) = (\<Sum>x\<leftarrow>xs. f x) * c"
by (induct xs, simp_all add: algebra_simps)

lemma listsum_abs:
shows "\<bar>listsum xs\<bar> \<le> listsum (map abs xs)"
by (induct xs, simp, simp add: order_trans [OF abs_triangle_ineq])

lemma listsum_mono:
shows "(\<And>x. x \<in> set xs \<Longrightarrow> f x \<le> g x) \<Longrightarrow> (\<Sum>x\<leftarrow>xs. f x) \<le> (\<Sum>x\<leftarrow>xs. g x)"

subsubsection {* @{text upt} *}

lemma upt_rec[code]: "[i..<j] = (if i<j then i#[Suc i..<j] else [])"
-- {* simp does not terminate! *}
by (induct j) auto

lemmas upt_rec_number_of[simp] = upt_rec[of "number_of m" "number_of n", standard]

lemma upt_conv_Nil [simp]: "j <= i ==> [i..<j] = []"
by (subst upt_rec) simp

lemma upt_eq_Nil_conv[simp]: "([i..<j] = []) = (j = 0 \<or> j <= i)"
by(induct j)simp_all

lemma upt_eq_Cons_conv:
"([i..<j] = x#xs) = (i < j & i = x & [i+1..<j] = xs)"
apply(induct j arbitrary: x xs)
apply simp
apply arith
done

lemma upt_Suc_append: "i <= j ==> [i..<(Suc j)] = [i..<j]@[j]"
-- {* Only needed if @{text upt_Suc} is deleted from the simpset. *}
by simp

lemma upt_conv_Cons: "i < j ==> [i..<j] = i # [Suc i..<j]"

lemma upt_add_eq_append: "i<=j ==> [i..<j+k] = [i..<j]@[j..<j+k]"
-- {* LOOPS as a simprule, since @{text "j <= j"}. *}
by (induct k) auto

lemma length_upt [simp]: "length [i..<j] = j - i"
by (induct j) (auto simp add: Suc_diff_le)

lemma nth_upt [simp]: "i + k < j ==> [i..<j] ! k = i + k"
apply (induct j)
apply (auto simp add: less_Suc_eq nth_append split: nat_diff_split)
done

lemma hd_upt[simp]: "i < j \<Longrightarrow> hd[i..<j] = i"

lemma last_upt[simp]: "i < j \<Longrightarrow> last[i..<j] = j - 1"
apply(cases j)
apply simp

lemma take_upt [simp]: "i+m <= n ==> take m [i..<n] = [i..<i+m]"
apply (induct m arbitrary: i, simp)
apply (subst upt_rec)
apply (rule sym)
apply (subst upt_rec)
apply (simp del: upt.simps)
done

lemma drop_upt[simp]: "drop m [i..<j] = [i+m..<j]"
apply(induct j)
apply auto
done

lemma map_Suc_upt: "map Suc [m..<n] = [Suc m..<Suc n]"
by (induct n) auto

lemma nth_map_upt: "i < n-m ==> (map f [m..<n]) ! i = f(m+i)"
apply (induct n m  arbitrary: i rule: diff_induct)
prefer 3 apply (subst map_Suc_upt[symmetric])
apply (auto simp add: less_diff_conv nth_upt)
done

lemma nth_take_lemma:
"k <= length xs ==> k <= length ys ==>
(!!i. i < k --> xs!i = ys!i) ==> take k xs = take k ys"
apply (atomize, induct k arbitrary: xs ys)
apply (simp_all add: less_Suc_eq_0_disj all_conj_distrib, clarify)
txt {* Both lists must be non-empty *}
apply (case_tac xs, simp)
apply (case_tac ys, clarify)
apply (simp (no_asm_use))
apply clarify
txt {* prenexing's needed, not miniscoping *}
apply (simp (no_asm_use) add: all_simps [symmetric] del: all_simps)
apply blast
done

lemma nth_equalityI:
"[| length xs = length ys; ALL i < length xs. xs!i = ys!i |] ==> xs = ys"
apply (frule nth_take_lemma [OF le_refl eq_imp_le])
done

lemma map_nth:
"map (\<lambda>i. xs ! i) [0..<length xs] = xs"
by (rule nth_equalityI, auto)

(* needs nth_equalityI *)
lemma list_all2_antisym:
"\<lbrakk> (\<And>x y. \<lbrakk>P x y; Q y x\<rbrakk> \<Longrightarrow> x = y); list_all2 P xs ys; list_all2 Q ys xs \<rbrakk>
\<Longrightarrow> xs = ys"
apply (rule nth_equalityI, blast, simp)
done

lemma take_equalityI: "(\<forall>i. take i xs = take i ys) ==> xs = ys"
-- {* The famous take-lemma. *}
apply (drule_tac x = "max (length xs) (length ys)" in spec)
done

lemma take_Cons':
"take n (x # xs) = (if n = 0 then [] else x # take (n - 1) xs)"
by (cases n) simp_all

lemma drop_Cons':
"drop n (x # xs) = (if n = 0 then x # xs else drop (n - 1) xs)"
by (cases n) simp_all

lemma nth_Cons': "(x # xs)!n = (if n = 0 then x else xs!(n - 1))"
by (cases n) simp_all

lemmas take_Cons_number_of = take_Cons'[of "number_of v",standard]
lemmas drop_Cons_number_of = drop_Cons'[of "number_of v",standard]
lemmas nth_Cons_number_of = nth_Cons'[of _ _ "number_of v",standard]

declare take_Cons_number_of [simp]
drop_Cons_number_of [simp]
nth_Cons_number_of [simp]

subsubsection {* @{text upto}: interval-list on @{typ int} *}

(* FIXME make upto tail recursive? *)

function upto :: "int \<Rightarrow> int \<Rightarrow> int list" ("(1[_../_])") where
"upto i j = (if i \<le> j then i # [i+1..j] else [])"
by auto
termination
by(relation "measure(%(i::int,j). nat(j - i + 1))") auto

declare upto.simps[code, simp del]

lemmas upto_rec_number_of[simp] =
upto.simps[of "number_of m" "number_of n", standard]

lemma upto_empty[simp]: "j < i \<Longrightarrow> [i..j] = []"

lemma set_upto[simp]: "set[i..j] = {i..j}"
apply(induct i j rule:upto.induct)
done

subsubsection {* @{text "distinct"} and @{text remdups} *}

lemma distinct_append [simp]:
"distinct (xs @ ys) = (distinct xs \<and> distinct ys \<and> set xs \<inter> set ys = {})"
by (induct xs) auto

lemma distinct_rev[simp]: "distinct(rev xs) = distinct xs"
by(induct xs) auto

lemma set_remdups [simp]: "set (remdups xs) = set xs"
by (induct xs) (auto simp add: insert_absorb)

lemma distinct_remdups [iff]: "distinct (remdups xs)"
by (induct xs) auto

lemma distinct_remdups_id: "distinct xs ==> remdups xs = xs"
by (induct xs, auto)

lemma remdups_id_iff_distinct [simp]: "remdups xs = xs \<longleftrightarrow> distinct xs"
by (metis distinct_remdups distinct_remdups_id)

lemma finite_distinct_list: "finite A \<Longrightarrow> EX xs. set xs = A & distinct xs"
by (metis distinct_remdups finite_list set_remdups)

lemma remdups_eq_nil_iff [simp]: "(remdups x = []) = (x = [])"
by (induct x, auto)

lemma remdups_eq_nil_right_iff [simp]: "([] = remdups x) = (x = [])"
by (induct x, auto)

lemma length_remdups_leq[iff]: "length(remdups xs) <= length xs"
by (induct xs) auto

lemma length_remdups_eq[iff]:
"(length (remdups xs) = length xs) = (remdups xs = xs)"
apply(induct xs)
apply auto
apply(subgoal_tac "length (remdups xs) <= length xs")
apply arith
apply(rule length_remdups_leq)
done

lemma remdups_filter: "remdups(filter P xs) = filter P (remdups xs)"
apply(induct xs)
apply auto
done

lemma distinct_map:
"distinct(map f xs) = (distinct xs & inj_on f (set xs))"
by (induct xs) auto

lemma distinct_filter [simp]: "distinct xs ==> distinct (filter P xs)"
by (induct xs) auto

lemma distinct_upt[simp]: "distinct[i..<j]"
by (induct j) auto

lemma distinct_upto[simp]: "distinct[i..j]"
apply(induct i j rule:upto.induct)
apply(subst upto.simps)
apply(simp)
done

lemma distinct_take[simp]: "distinct xs \<Longrightarrow> distinct (take i xs)"
apply(induct xs arbitrary: i)
apply simp
apply (case_tac i)
apply simp_all
apply(blast dest:in_set_takeD)
done

lemma distinct_drop[simp]: "distinct xs \<Longrightarrow> distinct (drop i xs)"
apply(induct xs arbitrary: i)
apply simp
apply (case_tac i)
apply simp_all
done

lemma distinct_list_update:
assumes d: "distinct xs" and a: "a \<notin> set xs - {xs!i}"
shows "distinct (xs[i:=a])"
proof (cases "i < length xs")
case True
with a have "a \<notin> set (take i xs @ xs ! i # drop (Suc i) xs) - {xs!i}"
apply (drule_tac id_take_nth_drop) by simp
with d True show ?thesis
apply (drule subst [OF id_take_nth_drop]) apply assumption
apply simp apply (cases "a = xs!i") apply simp by blast
next
case False with d show ?thesis by auto
qed

lemma distinct_concat:
assumes "distinct xs"
and "\<And> ys. ys \<in> set xs \<Longrightarrow> distinct ys"
and "\<And> ys zs. \<lbrakk> ys \<in> set xs ; zs \<in> set xs ; ys \<noteq> zs \<rbrakk> \<Longrightarrow> set ys \<inter> set zs = {}"
shows "distinct (concat xs)"
using assms by (induct xs) auto

text {* It is best to avoid this indexed version of distinct, but
sometimes it is useful. *}

lemma distinct_conv_nth:
"distinct xs = (\<forall>i < size xs. \<forall>j < size xs. i \<noteq> j --> xs!i \<noteq> xs!j)"
apply (induct xs, simp, simp)
apply (rule iffI, clarsimp)
apply (case_tac i)
apply (case_tac j, simp)
apply (case_tac j)
apply (clarsimp simp add: set_conv_nth, simp)
apply (rule conjI)
(*TOO SLOW
apply (metis Zero_neq_Suc gr0_conv_Suc in_set_conv_nth lessI less_trans_Suc nth_Cons' nth_Cons_Suc)
*)
apply (erule_tac x = 0 in allE, simp)
apply (erule_tac x = "Suc i" in allE, simp, clarsimp)
(*TOO SLOW
apply (metis Suc_Suc_eq lessI less_trans_Suc nth_Cons_Suc)
*)
apply (erule_tac x = "Suc i" in allE, simp)
apply (erule_tac x = "Suc j" in allE, simp)
done

lemma nth_eq_iff_index_eq:
"\<lbrakk> distinct xs; i < length xs; j < length xs \<rbrakk> \<Longrightarrow> (xs!i = xs!j) = (i = j)"
by(auto simp: distinct_conv_nth)

lemma distinct_card: "distinct xs ==> card (set xs) = size xs"
by (induct xs) auto

lemma card_distinct: "card (set xs) = size xs ==> distinct xs"
proof (induct xs)
case Nil thus ?case by simp
next
case (Cons x xs)
show ?case
proof (cases "x \<in> set xs")
case False with Cons show ?thesis by simp
next
case True with Cons.prems
have "card (set xs) = Suc (length xs)"
by (simp add: card_insert_if split: split_if_asm)
moreover have "card (set xs) \<le> length xs" by (rule card_length)
ultimately have False by simp
thus ?thesis ..
qed
qed

lemma not_distinct_decomp: "~ distinct ws ==> EX xs ys zs y. ws = xs@[y]@ys@[y]@zs"
apply (induct n == "length ws" arbitrary:ws) apply simp
apply(case_tac ws) apply simp
apply (simp split:split_if_asm)
apply (metis Cons_eq_appendI eq_Nil_appendI split_list)
done

lemma length_remdups_concat:
"length(remdups(concat xss)) = card(\<Union>xs \<in> set xss. set xs)"

lemma length_remdups_card_conv: "length(remdups xs) = card(set xs)"
proof -
have xs: "concat[xs] = xs" by simp
from length_remdups_concat[of "[xs]"] show ?thesis unfolding xs by simp
qed

subsubsection {* @{const insert} *}

lemma in_set_insert [simp]:
"x \<in> set xs \<Longrightarrow> List.insert x xs = xs"

lemma not_in_set_insert [simp]:
"x \<notin> set xs \<Longrightarrow> List.insert x xs = x # xs"

lemma insert_Nil [simp]:
"List.insert x [] = [x]"
by simp

lemma set_insert:
"set (List.insert x xs) = insert x (set xs)"

subsubsection {* @{text remove1} *}

lemma remove1_append:
"remove1 x (xs @ ys) =
(if x \<in> set xs then remove1 x xs @ ys else xs @ remove1 x ys)"
by (induct xs) auto

lemma in_set_remove1[simp]:
"a \<noteq> b \<Longrightarrow> a : set(remove1 b xs) = (a : set xs)"
apply (induct xs)
apply auto
done

lemma set_remove1_subset: "set(remove1 x xs) <= set xs"
apply(induct xs)
apply simp
apply simp
apply blast
done

lemma set_remove1_eq [simp]: "distinct xs ==> set(remove1 x xs) = set xs - {x}"
apply(induct xs)
apply simp
apply simp
apply blast
done

lemma length_remove1:
"length(remove1 x xs) = (if x : set xs then length xs - 1 else length xs)"
apply (induct xs)
apply (auto dest!:length_pos_if_in_set)
done

lemma remove1_filter_not[simp]:
"\<not> P x \<Longrightarrow> remove1 x (filter P xs) = filter P xs"
by(induct xs) auto

lemma notin_set_remove1[simp]: "x ~: set xs ==> x ~: set(remove1 y xs)"
apply(insert set_remove1_subset)
apply fast
done

lemma distinct_remove1[simp]: "distinct xs ==> distinct(remove1 x xs)"
by (induct xs) simp_all

subsubsection {* @{text removeAll} *}

lemma removeAll_filter_not_eq:
"removeAll x = filter (\<lambda>y. x \<noteq> y)"
proof
fix xs
show "removeAll x xs = filter (\<lambda>y. x \<noteq> y) xs"
by (induct xs) auto
qed

lemma removeAll_append[simp]:
"removeAll x (xs @ ys) = removeAll x xs @ removeAll x ys"
by (induct xs) auto

lemma set_removeAll[simp]: "set(removeAll x xs) = set xs - {x}"
by (induct xs) auto

lemma removeAll_id[simp]: "x \<notin> set xs \<Longrightarrow> removeAll x xs = xs"
by (induct xs) auto

(* Needs count:: 'a \<Rightarrow> a' list \<Rightarrow> nat
lemma length_removeAll:
"length(removeAll x xs) = length xs - count x xs"
*)

lemma removeAll_filter_not[simp]:
"\<not> P x \<Longrightarrow> removeAll x (filter P xs) = filter P xs"
by(induct xs) auto

lemma distinct_removeAll:
"distinct xs \<Longrightarrow> distinct (removeAll x xs)"

lemma distinct_remove1_removeAll:
"distinct xs ==> remove1 x xs = removeAll x xs"
by (induct xs) simp_all

lemma map_removeAll_inj_on: "inj_on f (insert x (set xs)) \<Longrightarrow>
map f (removeAll x xs) = removeAll (f x) (map f xs)"

lemma map_removeAll_inj: "inj f \<Longrightarrow>
map f (removeAll x xs) = removeAll (f x) (map f xs)"
by(metis map_removeAll_inj_on subset_inj_on subset_UNIV)

subsubsection {* @{text replicate} *}

lemma length_replicate [simp]: "length (replicate n x) = n"
by (induct n) auto

lemma map_replicate [simp]: "map f (replicate n x) = replicate n (f x)"
by (induct n) auto

lemma map_replicate_const:
"map (\<lambda> x. k) lst = replicate (length lst) k"
by (induct lst) auto

lemma replicate_app_Cons_same:
"(replicate n x) @ (x # xs) = x # replicate n x @ xs"
by (induct n) auto

lemma rev_replicate [simp]: "rev (replicate n x) = replicate n x"
apply (induct n, simp)
done

lemma replicate_add: "replicate (n + m) x = replicate n x @ replicate m x"
by (induct n) auto

text{* Courtesy of Matthias Daum: *}
lemma append_replicate_commute:
"replicate n x @ replicate k x = replicate k x @ replicate n x"
done

text{* Courtesy of Andreas Lochbihler: *}
lemma filter_replicate:
"filter P (replicate n x) = (if P x then replicate n x else [])"
by(induct n) auto

lemma hd_replicate [simp]: "n \<noteq> 0 ==> hd (replicate n x) = x"
by (induct n) auto

lemma tl_replicate [simp]: "n \<noteq> 0 ==> tl (replicate n x) = replicate (n - 1) x"
by (induct n) auto

lemma last_replicate [simp]: "n \<noteq> 0 ==> last (replicate n x) = x"
by (atomize (full), induct n) auto

lemma nth_replicate[simp]: "i < n ==> (replicate n x)!i = x"
apply (induct n arbitrary: i, simp)
apply (simp add: nth_Cons split: nat.split)
done

text{* Courtesy of Matthias Daum (2 lemmas): *}
lemma take_replicate[simp]: "take i (replicate k x) = replicate (min i k) x"
apply (case_tac "k \<le> i")
apply (drule not_leE)
apply (subgoal_tac "replicate k x = replicate i x @ replicate (k - i) x")
apply  simp
done

lemma drop_replicate[simp]: "drop i (replicate k x) = replicate (k-i) x"
apply (induct k arbitrary: i)
apply simp
apply clarsimp
apply (case_tac i)
apply simp
apply clarsimp
done

lemma set_replicate_Suc: "set (replicate (Suc n) x) = {x}"
by (induct n) auto

lemma set_replicate [simp]: "n \<noteq> 0 ==> set (replicate n x) = {x}"
by (fast dest!: not0_implies_Suc intro!: set_replicate_Suc)

lemma set_replicate_conv_if: "set (replicate n x) = (if n = 0 then {} else {x})"
by auto

lemma in_set_replicateD: "x : set (replicate n y) ==> x = y"
by (simp add: set_replicate_conv_if split: split_if_asm)

lemma replicate_append_same:
"replicate i x @ [x] = x # replicate i x"
by (induct i) simp_all

lemma map_replicate_trivial:
"map (\<lambda>i. x) [0..<i] = replicate i x"
by (induct i) (simp_all add: replicate_append_same)

lemma concat_replicate_trivial[simp]:
"concat (replicate i []) = []"
by (induct i) (auto simp add: map_replicate_const)

lemma replicate_empty[simp]: "(replicate n x = []) \<longleftrightarrow> n=0"
by (induct n) auto

lemma empty_replicate[simp]: "([] = replicate n x) \<longleftrightarrow> n=0"
by (induct n) auto

lemma replicate_eq_replicate[simp]:
"(replicate m x = replicate n y) \<longleftrightarrow> (m=n & (m\<noteq>0 \<longrightarrow> x=y))"
apply(induct m arbitrary: n)
apply simp
apply(induct_tac n)
apply auto
done

subsubsection{*@{text rotate1} and @{text rotate}*}

lemma rotate_simps[simp]: "rotate1 [] = [] \<and> rotate1 (x#xs) = xs @ [x]"

lemma rotate0[simp]: "rotate 0 = id"

lemma rotate_Suc[simp]: "rotate (Suc n) xs = rotate1(rotate n xs)"

"rotate (m+n) = rotate m o rotate n"

lemma rotate_rotate: "rotate m (rotate n xs) = rotate (m+n) xs"

lemma rotate1_rotate_swap: "rotate1 (rotate n xs) = rotate n (rotate1 xs)"

lemma rotate1_length01[simp]: "length xs <= 1 \<Longrightarrow> rotate1 xs = xs"
by(cases xs) simp_all

lemma rotate_length01[simp]: "length xs <= 1 \<Longrightarrow> rotate n xs = xs"
apply(induct n)
apply simp
done

lemma rotate1_hd_tl: "xs \<noteq> [] \<Longrightarrow> rotate1 xs = tl xs @ [hd xs]"

lemma rotate_drop_take:
"rotate n xs = drop (n mod length xs) xs @ take (n mod length xs) xs"
apply(induct n)
apply simp
apply(cases "xs = []")
apply (simp)
apply(case_tac "n mod length xs = 0")
take_hd_drop linorder_not_le)
done

lemma rotate_conv_mod: "rotate n xs = rotate (n mod length xs) xs"

lemma rotate_id[simp]: "n mod length xs = 0 \<Longrightarrow> rotate n xs = xs"

lemma length_rotate1[simp]: "length(rotate1 xs) = length xs"

lemma length_rotate[simp]: "length(rotate n xs) = length xs"
by (induct n arbitrary: xs) (simp_all add:rotate_def)

lemma distinct1_rotate[simp]: "distinct(rotate1 xs) = distinct xs"

lemma distinct_rotate[simp]: "distinct(rotate n xs) = distinct xs"

lemma rotate_map: "rotate n (map f xs) = map f (rotate n xs)"

lemma set_rotate1[simp]: "set(rotate1 xs) = set xs"

lemma set_rotate[simp]: "set(rotate n xs) = set xs"

lemma rotate1_is_Nil_conv[simp]: "(rotate1 xs = []) = (xs = [])"

lemma rotate_is_Nil_conv[simp]: "(rotate n xs = []) = (xs = [])"

lemma rotate_rev:
"rotate n (rev xs) = rev(rotate (length xs - (n mod length xs)) xs)"
apply(cases "length xs = 0")
apply simp
apply(cases "n mod length xs = 0")
apply simp
done

lemma hd_rotate_conv_nth: "xs \<noteq> [] \<Longrightarrow> hd(rotate n xs) = xs!(n mod length xs)"
apply(subgoal_tac "length xs \<noteq> 0")
prefer 2 apply simp
using mod_less_divisor[of "length xs" n] by arith

subsubsection {* @{text sublist} --- a generalization of @{text nth} to sets *}

lemma sublist_empty [simp]: "sublist xs {} = []"

lemma sublist_nil [simp]: "sublist [] A = []"

lemma length_sublist:
"length(sublist xs I) = card{i. i < length xs \<and> i : I}"

lemma sublist_shift_lemma_Suc:
"map fst (filter (%p. P(Suc(snd p))) (zip xs is)) =
map fst (filter (%p. P(snd p)) (zip xs (map Suc is)))"
apply(induct xs arbitrary: "is")
apply simp
apply (case_tac "is")
apply simp
apply simp
done

lemma sublist_shift_lemma:
"map fst [p<-zip xs [i..<i + length xs] . snd p : A] =
map fst [p<-zip xs [0..<length xs] . snd p + i : A]"

lemma sublist_append:
"sublist (l @ l') A = sublist l A @ sublist l' {j. j + length l : A}"
apply (unfold sublist_def)
apply (induct l' rule: rev_induct, simp)
done

lemma sublist_Cons:
"sublist (x # l) A = (if 0:A then [x] else []) @ sublist l {j. Suc j : A}"
apply (induct l rule: rev_induct)
apply (simp del: append_Cons add: append_Cons[symmetric] sublist_append)
done

lemma set_sublist: "set(sublist xs I) = {xs!i|i. i<size xs \<and> i \<in> I}"
apply(induct xs arbitrary: I)
apply(auto simp: sublist_Cons nth_Cons split:nat.split dest!: gr0_implies_Suc)
done

lemma set_sublist_subset: "set(sublist xs I) \<subseteq> set xs"

lemma notin_set_sublistI[simp]: "x \<notin> set xs \<Longrightarrow> x \<notin> set(sublist xs I)"

lemma in_set_sublistD: "x \<in> set(sublist xs I) \<Longrightarrow> x \<in> set xs"

lemma sublist_singleton [simp]: "sublist [x] A = (if 0 : A then [x] else [])"

lemma distinct_sublistI[simp]: "distinct xs \<Longrightarrow> distinct(sublist xs I)"
apply(induct xs arbitrary: I)
apply simp
done

lemma sublist_upt_eq_take [simp]: "sublist l {..<n} = take n l"
apply (induct l rule: rev_induct, simp)
apply (simp split: nat_diff_split add: sublist_append)
done

lemma filter_in_sublist:
"distinct xs \<Longrightarrow> filter (%x. x \<in> set(sublist xs s)) xs = sublist xs s"
proof (induct xs arbitrary: s)
case Nil thus ?case by simp
next
case (Cons a xs)
moreover hence "!x. x: set xs \<longrightarrow> x \<noteq> a" by auto
ultimately show ?case by(simp add: sublist_Cons cong:filter_cong)
qed

subsubsection {* @{const splice} *}

lemma splice_Nil2 [simp, code]:
"splice xs [] = xs"
by (cases xs) simp_all

lemma splice_Cons_Cons [simp, code]:
"splice (x#xs) (y#ys) = x # y # splice xs ys"
by simp

declare splice.simps(2) [simp del, code del]

lemma length_splice[simp]: "length(splice xs ys) = length xs + length ys"
apply(induct xs arbitrary: ys) apply simp
apply(case_tac ys)
apply auto
done

subsubsection {* Transpose *}

function transpose where
"transpose []             = []" |
"transpose ([]     # xss) = transpose xss" |
"transpose ((x#xs) # xss) =
(x # [h. (h#t) \<leftarrow> xss]) # transpose (xs # [t. (h#t) \<leftarrow> xss])"
by pat_completeness auto

"concat (map (list_case [] (\<lambda>h t. [h])) xss) =
map (\<lambda>xs. hd xs) [ys\<leftarrow>xss . ys \<noteq> []]"
by (induct xss) (auto split: list.split)

lemma transpose_aux_filter_tail:
"concat (map (list_case [] (\<lambda>h t. [t])) xss) =
map (\<lambda>xs. tl xs) [ys\<leftarrow>xss . ys \<noteq> []]"
by (induct xss) (auto split: list.split)

lemma transpose_aux_max:
"max (Suc (length xs)) (foldr (\<lambda>xs. max (length xs)) xss 0) =
Suc (max (length xs) (foldr (\<lambda>x. max (length x - Suc 0)) [ys\<leftarrow>xss . ys\<noteq>[]] 0))"
(is "max _ ?foldB = Suc (max _ ?foldA)")
proof (cases "[ys\<leftarrow>xss . ys\<noteq>[]] = []")
case True
hence "foldr (\<lambda>xs. max (length xs)) xss 0 = 0"
proof (induct xss)
case (Cons x xs)
moreover hence "x = []" by (cases x) auto
ultimately show ?case by auto
qed simp
thus ?thesis using True by simp
next
case False

have foldA: "?foldA = foldr (\<lambda>x. max (length x)) [ys\<leftarrow>xss . ys \<noteq> []] 0 - 1"
by (induct xss) auto
have foldB: "?foldB = foldr (\<lambda>x. max (length x)) [ys\<leftarrow>xss . ys \<noteq> []] 0"
by (induct xss) auto

have "0 < ?foldB"
proof -
from False
obtain z zs where zs: "[ys\<leftarrow>xss . ys \<noteq> []] = z#zs" by (auto simp: neq_Nil_conv)
hence "z \<in> set ([ys\<leftarrow>xss . ys \<noteq> []])" by auto
hence "z \<noteq> []" by auto
thus ?thesis
unfolding foldB zs
by (auto simp: max_def intro: less_le_trans)
qed
thus ?thesis
unfolding foldA foldB max_Suc_Suc[symmetric]
by simp
qed

termination transpose
by (relation "measure (\<lambda>xs. foldr (\<lambda>xs. max (length xs)) xs 0 + length xs)")
(auto simp: transpose_aux_filter_tail foldr_map comp_def transpose_aux_max less_Suc_eq_le)

lemma transpose_empty: "(transpose xs = []) \<longleftrightarrow> (\<forall>x \<in> set xs. x = [])"
by (induct rule: transpose.induct) simp_all

lemma length_transpose:
fixes xs :: "'a list list"
shows "length (transpose xs) = foldr (\<lambda>xs. max (length xs)) xs 0"
by (induct rule: transpose.induct)
(auto simp: transpose_aux_filter_tail foldr_map comp_def transpose_aux_max
max_Suc_Suc[symmetric] simp del: max_Suc_Suc)

lemma nth_transpose:
fixes xs :: "'a list list"
assumes "i < length (transpose xs)"
shows "transpose xs ! i = map (\<lambda>xs. xs ! i) [ys \<leftarrow> xs. i < length ys]"
using assms proof (induct arbitrary: i rule: transpose.induct)
case (3 x xs xss)
def XS == "(x # xs) # xss"
hence [simp]: "XS \<noteq> []" by auto
thus ?case
proof (cases i)
case 0
next
case (Suc j)
have *: "\<And>xss. xs # map tl xss = map tl ((x#xs)#xss)" by simp
have **: "\<And>xss. (x#xs) # filter (\<lambda>ys. ys \<noteq> []) xss = filter (\<lambda>ys. ys \<noteq> []) ((x#xs)#xss)" by simp
{ fix x have "Suc j < length x \<longleftrightarrow> x \<noteq> [] \<and> j < length x - Suc 0"
by (cases x) simp_all
} note *** = this

have j_less: "j < length (transpose (xs # concat (map (list_case [] (\<lambda>h t. [t])) xss)))"
using "3.prems" by (simp add: transpose_aux_filter_tail length_transpose Suc)

show ?thesis
unfolding transpose.simps i = Suc j nth_Cons_Suc "3.hyps"[OF j_less]
apply (auto simp: transpose_aux_filter_tail filter_map comp_def length_transpose * ** *** XS_def[symmetric])
apply (rule_tac y=x in list.exhaust)
by auto
qed
qed simp_all

lemma transpose_map_map:
"transpose (map (map f) xs) = map (map f) (transpose xs)"
proof (rule nth_equalityI, safe)
have [simp]: "length (transpose (map (map f) xs)) = length (transpose xs)"
by (simp add: length_transpose foldr_map comp_def)
show "length (transpose (map (map f) xs)) = length (map (map f) (transpose xs))" by simp

fix i assume "i < length (transpose (map (map f) xs))"
thus "transpose (map (map f) xs) ! i = map (map f) (transpose xs) ! i"
by (simp add: nth_transpose filter_map comp_def)
qed

subsubsection {* (In)finiteness *}

lemma finite_maxlen:
"finite (M::'a list set) ==> EX n. ALL s:M. size s < n"
proof (induct rule: finite.induct)
case emptyI show ?case by simp
next
case (insertI M xs)
then obtain n where "\<forall>s\<in>M. length s < n" by blast
hence "ALL s:insert xs M. size s < max n (size xs) + 1" by auto
thus ?case ..
qed

lemma finite_lists_length_eq:
assumes "finite A"
shows "finite {xs. set xs \<subseteq> A \<and> length xs = n}" (is "finite (?S n)")
proof(induct n)
case 0 show ?case by simp
next
case (Suc n)
have "?S (Suc n) = (\<Union>x\<in>A. (\<lambda>xs. x#xs)  ?S n)"
by (auto simp:length_Suc_conv)
then show ?case using finite A
by (auto intro: finite_imageI Suc) (* FIXME metis? *)
qed

lemma finite_lists_length_le:
assumes "finite A" shows "finite {xs. set xs \<subseteq> A \<and> length xs \<le> n}"
(is "finite ?S")
proof-
have "?S = (\<Union>n\<in>{0..n}. {xs. set xs \<subseteq> A \<and> length xs = n})" by auto
thus ?thesis by (auto intro: finite_lists_length_eq[OF finite A])
qed

lemma infinite_UNIV_listI: "~ finite(UNIV::'a list set)"
apply(rule notI)
apply(drule finite_maxlen)
apply (metis UNIV_I length_replicate less_not_refl)
done

subsection {* Sorting *}

text{* Currently it is not shown that @{const sort} returns a
permutation of its input because the nicest proof is via multisets,
which are not yet available. Alternatively one could define a function
that counts the number of occurrences of an element in a list and use
that instead of multisets to state the correctness property. *}

context linorder
begin

lemma length_insert[simp] : "length (insort_key f x xs) = Suc (length xs)"
by (induct xs, auto)

lemma insort_left_comm:
"insort x (insort y xs) = insort y (insort x xs)"
by (induct xs) auto

lemma fun_left_comm_insort:
"fun_left_comm insort"
proof
qed (fact insort_left_comm)

lemma sort_key_simps [simp]:
"sort_key f [] = []"
"sort_key f (x#xs) = insort_key f x (sort_key f xs)"

lemma sort_foldl_insort:
"sort xs = foldl (\<lambda>ys x. insort x ys) [] xs"
by (simp add: sort_key_def foldr_foldl foldl_rev insort_left_comm)

lemma length_sort[simp]: "length (sort_key f xs) = length xs"
by (induct xs, auto)

lemma sorted_Cons: "sorted (x#xs) = (sorted xs & (ALL y:set xs. x <= y))"
apply(induct xs arbitrary: x) apply simp
by simp (blast intro: order_trans)

lemma sorted_append:
"sorted (xs@ys) = (sorted xs & sorted ys & (\<forall>x \<in> set xs. \<forall>y \<in> set ys. x\<le>y))"
by (induct xs) (auto simp add:sorted_Cons)

lemma sorted_nth_mono:
"sorted xs \<Longrightarrow> i \<le> j \<Longrightarrow> j < length xs \<Longrightarrow> xs!i \<le> xs!j"
by (induct xs arbitrary: i j) (auto simp:nth_Cons' sorted_Cons)

lemma sorted_rev_nth_mono:
"sorted (rev xs) \<Longrightarrow> i \<le> j \<Longrightarrow> j < length xs \<Longrightarrow> xs!j \<le> xs!i"
using sorted_nth_mono[ of "rev xs" "length xs - j - 1" "length xs - i - 1"]
rev_nth[of "length xs - i - 1" "xs"] rev_nth[of "length xs - j - 1" "xs"]
by auto

lemma sorted_nth_monoI:
"(\<And> i j. \<lbrakk> i \<le> j ; j < length xs \<rbrakk> \<Longrightarrow> xs ! i \<le> xs ! j) \<Longrightarrow> sorted xs"
proof (induct xs)
case (Cons x xs)
have "sorted xs"
proof (rule Cons.hyps)
fix i j assume "i \<le> j" and "j < length xs"
with Cons.prems[of "Suc i" "Suc j"]
show "xs ! i \<le> xs ! j" by auto
qed
moreover
{
fix y assume "y \<in> set xs"
then obtain j where "j < length xs" and "xs ! j = y"
unfolding in_set_conv_nth by blast
with Cons.prems[of 0 "Suc j"]
have "x \<le> y"
by auto
}
ultimately
show ?case
unfolding sorted_Cons by auto
qed simp

lemma sorted_equals_nth_mono:
"sorted xs = (\<forall>j < length xs. \<forall>i \<le> j. xs ! i \<le> xs ! j)"
by (auto intro: sorted_nth_monoI sorted_nth_mono)

lemma set_insort: "set(insort_key f x xs) = insert x (set xs)"
by (induct xs) auto

lemma set_sort[simp]: "set(sort_key f xs) = set xs"

lemma distinct_insort: "distinct (insort_key f x xs) = (x \<notin> set xs \<and> distinct xs)"
by(induct xs)(auto simp:set_insort)

lemma distinct_sort[simp]: "distinct (sort_key f xs) = distinct xs"

lemma sorted_insort_key: "sorted (map f (insort_key f x xs)) = sorted (map f xs)"
by(induct xs)(auto simp:sorted_Cons set_insort)

lemma sorted_insort: "sorted (insort x xs) = sorted xs"
using sorted_insort_key[where f="\<lambda>x. x"] by simp

theorem sorted_sort_key[simp]: "sorted (map f (sort_key f xs))"
by(induct xs)(auto simp:sorted_insort_key)

theorem sorted_sort[simp]: "sorted (sort xs)"
by(induct xs)(auto simp:sorted_insort)

lemma insort_is_Cons: "\<forall>x\<in>set xs. f a \<le> f x \<Longrightarrow> insort_key f a xs = a # xs"
by (cases xs) auto

lemma sorted_remove1: "sorted xs \<Longrightarrow> sorted (remove1 a xs)"

lemma insort_key_remove1: "\<lbrakk> a \<in> set xs; sorted (map f xs) ; inj_on f (set xs) \<rbrakk>
\<Longrightarrow> insort_key f a (remove1 a xs) = xs"
proof (induct xs)
case (Cons x xs)
thus ?case
proof (cases "x = a")
case False
hence "f x \<noteq> f a" using Cons.prems by auto
hence "f x < f a" using Cons.prems by (auto simp: sorted_Cons)
thus ?thesis using Cons by (auto simp: sorted_Cons insort_is_Cons)
qed (auto simp: sorted_Cons insort_is_Cons)
qed simp

lemma insort_remove1: "\<lbrakk> a \<in> set xs; sorted xs \<rbrakk> \<Longrightarrow> insort a (remove1 a xs) = xs"
using insort_key_remove1[where f="\<lambda>x. x"] by simp

lemma sorted_remdups[simp]:
"sorted l \<Longrightarrow> sorted (remdups l)"
by (induct l) (auto simp: sorted_Cons)

lemma sorted_distinct_set_unique:
assumes "sorted xs" "distinct xs" "sorted ys" "distinct ys" "set xs = set ys"
shows "xs = ys"
proof -
from assms have 1: "length xs = length ys" by (auto dest!: distinct_card)
from assms show ?thesis
proof(induct rule:list_induct2[OF 1])
case 1 show ?case by simp
next
case 2 thus ?case by (simp add:sorted_Cons)
(metis Diff_insert_absorb antisym insertE insert_iff)
qed
qed

lemma finite_sorted_distinct_unique:
shows "finite A \<Longrightarrow> EX! xs. set xs = A & sorted xs & distinct xs"
apply(drule finite_distinct_list)
apply clarify
apply(rule_tac a="sort xs" in ex1I)
apply (auto simp: sorted_distinct_set_unique)
done

lemma sorted_take:
"sorted xs \<Longrightarrow> sorted (take n xs)"
proof (induct xs arbitrary: n rule: sorted.induct)
case 1 show ?case by simp
next
case 2 show ?case by (cases n) simp_all
next
case (3 x y xs)
then have "x \<le> y" by simp
show ?case proof (cases n)
case 0 then show ?thesis by simp
next
case (Suc m)
with 3 have "sorted (take m (y # xs))" by simp
with Suc  x \<le> y show ?thesis by (cases m) simp_all
qed
qed

lemma sorted_drop:
"sorted xs \<Longrightarrow> sorted (drop n xs)"
proof (induct xs arbitrary: n rule: sorted.induct)
case 1 show ?case by simp
next
case 2 show ?case by (cases n) simp_all
next
case 3 then show ?case by (cases n) simp_all
qed

lemma sorted_dropWhile: "sorted xs \<Longrightarrow> sorted (dropWhile P xs)"
unfolding dropWhile_eq_drop by (rule sorted_drop)

lemma sorted_takeWhile: "sorted xs \<Longrightarrow> sorted (takeWhile P xs)"
apply (subst takeWhile_eq_take) by (rule sorted_take)

lemma sorted_filter:
"sorted (map f xs) \<Longrightarrow> sorted (map f (filter P xs))"
by (induct xs) (simp_all add: sorted_Cons)

lemma foldr_max_sorted:
assumes "sorted (rev xs)"
shows "foldr max xs y = (if xs = [] then y else max (xs ! 0) y)"
using assms proof (induct xs)
case (Cons x xs)
moreover hence "sorted (rev xs)" using sorted_append by auto
ultimately show ?case
by (cases xs, auto simp add: sorted_append max_def)
qed simp

lemma filter_equals_takeWhile_sorted_rev:
assumes sorted: "sorted (rev (map f xs))"
shows "[x \<leftarrow> xs. t < f x] = takeWhile (\<lambda> x. t < f x) xs"
(is "filter ?P xs = ?tW")
proof (rule takeWhile_eq_filter[symmetric])
let "?dW" = "dropWhile ?P xs"
fix x assume "x \<in> set ?dW"
then obtain i where i: "i < length ?dW" and nth_i: "x = ?dW ! i"
unfolding in_set_conv_nth by auto
hence "length ?tW + i < length (?tW @ ?dW)"
unfolding length_append by simp
hence i': "length (map f ?tW) + i < length (map f xs)" by simp
have "(map f ?tW @ map f ?dW) ! (length (map f ?tW) + i) \<le>
(map f ?tW @ map f ?dW) ! (length (map f ?tW) + 0)"
using sorted_rev_nth_mono[OF sorted _ i', of "length ?tW"]
unfolding map_append[symmetric] by simp
hence "f x \<le> f (?dW ! 0)"
unfolding nth_append_length_plus nth_i
using i preorder_class.le_less_trans[OF le0 i] by simp
also have "... \<le> t"
using hd_dropWhile[of "?P" xs] le0[THEN preorder_class.le_less_trans, OF i]
using hd_conv_nth[of "?dW"] by simp
finally show "\<not> t < f x" by simp
qed

end

lemma sorted_upt[simp]: "sorted[i..<j]"

lemma sorted_upto[simp]: "sorted[i..j]"
apply(induct i j rule:upto.induct)
apply(subst upto.simps)
done

subsubsection {* @{const transpose} on sorted lists *}

lemma sorted_transpose[simp]:
shows "sorted (rev (map length (transpose xs)))"
by (auto simp: sorted_equals_nth_mono rev_nth nth_transpose
length_filter_conv_card intro: card_mono)

lemma transpose_max_length:
"foldr (\<lambda>xs. max (length xs)) (transpose xs) 0 = length [x \<leftarrow> xs. x \<noteq> []]"
(is "?L = ?R")
proof (cases "transpose xs = []")
case False
have "?L = foldr max (map length (transpose xs)) 0"
also have "... = length (transpose xs ! 0)"
using False sorted_transpose by (simp add: foldr_max_sorted)
finally show ?thesis
using False by (simp add: nth_transpose)
next
case True
hence "[x \<leftarrow> xs. x \<noteq> []] = []"
by (auto intro!: filter_False simp: transpose_empty)
thus ?thesis by (simp add: transpose_empty True)
qed

lemma length_transpose_sorted:
fixes xs :: "'a list list"
assumes sorted: "sorted (rev (map length xs))"
shows "length (transpose xs) = (if xs = [] then 0 else length (xs ! 0))"
proof (cases "xs = []")
case False
thus ?thesis
using foldr_max_sorted[OF sorted] False
unfolding length_transpose foldr_map comp_def
by simp
qed simp

lemma nth_nth_transpose_sorted[simp]:
fixes xs :: "'a list list"
assumes sorted: "sorted (rev (map length xs))"
and i: "i < length (transpose xs)"
and j: "j < length [ys \<leftarrow> xs. i < length ys]"
shows "transpose xs ! i ! j = xs ! j  ! i"
using j filter_equals_takeWhile_sorted_rev[OF sorted, of i]
nth_transpose[OF i] nth_map[OF j]

lemma transpose_column_length:
fixes xs :: "'a list list"
assumes sorted: "sorted (rev (map length xs))" and "i < length xs"
shows "length (filter (\<lambda>ys. i < length ys) (transpose xs)) = length (xs ! i)"
proof -
have "xs \<noteq> []" using i < length xs by auto
note filter_equals_takeWhile_sorted_rev[OF sorted, simp]
{ fix j assume "j \<le> i"
note sorted_rev_nth_mono[OF sorted, of j i, simplified, OF this i < length xs]
} note sortedE = this[consumes 1]

have "{j. j < length (transpose xs) \<and> i < length (transpose xs ! j)}
= {..< length (xs ! i)}"
proof safe
fix j
assume "j < length (transpose xs)" and "i < length (transpose xs ! j)"
with this(2) nth_transpose[OF this(1)]
have "i < length (takeWhile (\<lambda>ys. j < length ys) xs)" by simp
from nth_mem[OF this] takeWhile_nth[OF this]
show "j < length (xs ! i)" by (auto dest: set_takeWhileD)
next
fix j assume "j < length (xs ! i)"
thus "j < length (transpose xs)"
using foldr_max_sorted[OF sorted] xs \<noteq> [] sortedE[OF le0]
by (auto simp: length_transpose comp_def foldr_map)

have "Suc i \<le> length (takeWhile (\<lambda>ys. j < length ys) xs)"
using i < length xs j < length (xs ! i) less_Suc_eq_le
by (auto intro!: length_takeWhile_less_P_nth dest!: sortedE)
with nth_transpose[OF j < length (transpose xs)]
show "i < length (transpose xs ! j)" by simp
qed
thus ?thesis by (simp add: length_filter_conv_card)
qed

lemma transpose_column:
fixes xs :: "'a list list"
assumes sorted: "sorted (rev (map length xs))" and "i < length xs"
shows "map (\<lambda>ys. ys ! i) (filter (\<lambda>ys. i < length ys) (transpose xs))
= xs ! i" (is "?R = _")
proof (rule nth_equalityI, safe)
show length: "length ?R = length (xs ! i)"
using transpose_column_length[OF assms] by simp

fix j assume j: "j < length ?R"
note * = less_le_trans[OF this, unfolded length_map, OF length_filter_le]
from j have j_less: "j < length (xs ! i)" using length by simp
have i_less_tW: "Suc i \<le> length (takeWhile (\<lambda>ys. Suc j \<le> length ys) xs)"
proof (rule length_takeWhile_less_P_nth)
show "Suc i \<le> length xs" using i < length xs by simp
fix k assume "k < Suc i"
hence "k \<le> i" by auto
with sorted_rev_nth_mono[OF sorted this] i < length xs
have "length (xs ! i) \<le> length (xs ! k)" by simp
thus "Suc j \<le> length (xs ! k)" using j_less by simp
qed
have i_less_filter: "i < length [ys\<leftarrow>xs . j < length ys]"
unfolding filter_equals_takeWhile_sorted_rev[OF sorted, of j]
using i_less_tW by (simp_all add: Suc_le_eq)
from j show "?R ! j = xs ! i ! j"
unfolding filter_equals_takeWhile_sorted_rev[OF sorted_transpose, of i]
by (simp add: takeWhile_nth nth_nth_transpose_sorted[OF sorted * i_less_filter])
qed

lemma transpose_transpose:
fixes xs :: "'a list list"
assumes sorted: "sorted (rev (map length xs))"
shows "transpose (transpose xs) = takeWhile (\<lambda>x. x \<noteq> []) xs" (is "?L = ?R")
proof -
have len: "length ?L = length ?R"
unfolding length_transpose transpose_max_length
using filter_equals_takeWhile_sorted_rev[OF sorted, of 0]
by simp

{ fix i assume "i < length ?R"
with less_le_trans[OF _ length_takeWhile_le[of _ xs]]
have "i < length xs" by simp
} note * = this
show ?thesis
by (rule nth_equalityI)
(simp_all add: len nth_transpose transpose_column[OF sorted] * takeWhile_nth)
qed

theorem transpose_rectangle:
assumes "xs = [] \<Longrightarrow> n = 0"
assumes rect: "\<And> i. i < length xs \<Longrightarrow> length (xs ! i) = n"
shows "transpose xs = map (\<lambda> i. map (\<lambda> j. xs ! j ! i) [0..<length xs]) [0..<n]"
(is "?trans = ?map")
proof (rule nth_equalityI)
have "sorted (rev (map length xs))"
by (auto simp: rev_nth rect intro!: sorted_nth_monoI)
from foldr_max_sorted[OF this] assms
show len: "length ?trans = length ?map"
by (simp_all add: length_transpose foldr_map comp_def)
moreover
{ fix i assume "i < n" hence "[ys\<leftarrow>xs . i < length ys] = xs"
using rect by (auto simp: in_set_conv_nth intro!: filter_True) }
ultimately show "\<forall>i < length ?trans. ?trans ! i = ?map ! i"
by (auto simp: nth_transpose intro: nth_equalityI)
qed

subsubsection {* @{text sorted_list_of_set} *}

text{* This function maps (finite) linearly ordered sets to sorted
lists. Warning: in most cases it is not a good idea to convert from
sets to lists but one should convert in the other direction (via
@{const set}). *}

context linorder
begin

definition sorted_list_of_set :: "'a set \<Rightarrow> 'a list" where
"sorted_list_of_set = Finite_Set.fold insort []"

lemma sorted_list_of_set_empty [simp]:
"sorted_list_of_set {} = []"

lemma sorted_list_of_set_insert [simp]:
assumes "finite A"
shows "sorted_list_of_set (insert x A) = insort x (sorted_list_of_set (A - {x}))"
proof -
interpret fun_left_comm insort by (fact fun_left_comm_insort)
with assms show ?thesis by (simp add: sorted_list_of_set_def fold_insert_remove)
qed

lemma sorted_list_of_set [simp]:
"finite A \<Longrightarrow> set (sorted_list_of_set A) = A \<and> sorted (sorted_list_of_set A)
\<and> distinct (sorted_list_of_set A)"
by (induct A rule: finite_induct) (simp_all add: set_insort sorted_insort distinct_insort)

lemma sorted_list_of_set_sort_remdups:
"sorted_list_of_set (set xs) = sort (remdups xs)"
proof -
interpret fun_left_comm insort by (fact fun_left_comm_insort)
show ?thesis by (simp add: sort_foldl_insort sorted_list_of_set_def fold_set_remdups)
qed

end

subsubsection {* @{text lists}: the list-forming operator over sets *}

inductive_set
lists :: "'a set => 'a list set"
for A :: "'a set"
where
Nil [intro!]: "[]: lists A"
| Cons [intro!,noatp]: "[| a: A; l: lists A|] ==> a#l : lists A"

inductive_cases listsE [elim!,noatp]: "x#l : lists A"
inductive_cases listspE [elim!,noatp]: "listsp A (x # l)"

lemma listsp_mono [mono]: "A \<le> B ==> listsp A \<le> listsp B"
by (rule predicate1I, erule listsp.induct, (blast dest: predicate1D)+)

lemmas lists_mono = listsp_mono [to_set pred_subset_eq]

lemma listsp_infI:
assumes l: "listsp A l" shows "listsp B l ==> listsp (inf A B) l" using l
by induct blast+

lemmas lists_IntI = listsp_infI [to_set]

lemma listsp_inf_eq [simp]: "listsp (inf A B) = inf (listsp A) (listsp B)"
proof (rule mono_inf [where f=listsp, THEN order_antisym])
show "mono listsp" by (simp add: mono_def listsp_mono)
show "inf (listsp A) (listsp B) \<le> listsp (inf A B)" by (blast intro!: listsp_infI predicate1I)
qed

lemmas listsp_conj_eq [simp] = listsp_inf_eq [simplified inf_fun_eq inf_bool_eq]

lemmas lists_Int_eq [simp] = listsp_inf_eq [to_set pred_equals_eq]

lemma append_in_listsp_conv [iff]:
"(listsp A (xs @ ys)) = (listsp A xs \<and> listsp A ys)"
by (induct xs) auto

lemmas append_in_lists_conv [iff] = append_in_listsp_conv [to_set]

lemma in_listsp_conv_set: "(listsp A xs) = (\<forall>x \<in> set xs. A x)"
-- {* eliminate @{text listsp} in favour of @{text set} *}
by (induct xs) auto

lemmas in_lists_conv_set = in_listsp_conv_set [to_set]

lemma in_listspD [dest!,noatp]: "listsp A xs ==> \<forall>x\<in>set xs. A x"
by (rule in_listsp_conv_set [THEN iffD1])

lemmas in_listsD [dest!,noatp] = in_listspD [to_set]

lemma in_listspI [intro!,noatp]: "\<forall>x\<in>set xs. A x ==> listsp A xs"
by (rule in_listsp_conv_set [THEN iffD2])

lemmas in_listsI [intro!,noatp] = in_listspI [to_set]

lemma lists_UNIV [simp]: "lists UNIV = UNIV"
by auto

subsubsection {* Inductive definition for membership *}

inductive ListMem :: "'a \<Rightarrow> 'a list \<Rightarrow> bool"
where
elem:  "ListMem x (x # xs)"
| insert:  "ListMem x xs \<Longrightarrow> ListMem x (y # xs)"

lemma ListMem_iff: "(ListMem x xs) = (x \<in> set xs)"
apply (rule iffI)
apply (induct set: ListMem)
apply auto
apply (induct xs)
apply (auto intro: ListMem.intros)
done

subsubsection {* Lists as Cartesian products *}

text{*@{text"set_Cons A Xs"}: the set of lists with head drawn from
@{term A} and tail drawn from @{term Xs}.*}

definition
set_Cons :: "'a set \<Rightarrow> 'a list set \<Rightarrow> 'a list set" where
[code del]: "set_Cons A XS = {z. \<exists>x xs. z = x # xs \<and> x \<in> A \<and> xs \<in> XS}"

lemma set_Cons_sing_Nil [simp]: "set_Cons A {[]} = (%x. [x])A"

text{*Yields the set of lists, all of the same length as the argument and
with elements drawn from the corresponding element of the argument.*}

primrec
listset :: "'a set list \<Rightarrow> 'a list set" where
"listset [] = {[]}"
|  "listset (A # As) = set_Cons A (listset As)"

subsection {* Relations on Lists *}

subsubsection {* Length Lexicographic Ordering *}

text{*These orderings preserve well-foundedness: shorter lists
precede longer lists. These ordering are not used in dictionaries.*}

primrec -- {*The lexicographic ordering for lists of the specified length*}
lexn :: "('a \<times> 'a) set \<Rightarrow> nat \<Rightarrow> ('a list \<times> 'a list) set" where
"lexn r 0 = {}"
| "lexn r (Suc n) = (prod_fun (%(x, xs). x#xs) (%(x, xs). x#xs)  (r <*lex*> lexn r n)) Int
{(xs, ys). length xs = Suc n \<and> length ys = Suc n}"

definition
lex :: "('a \<times> 'a) set \<Rightarrow> ('a list \<times> 'a list) set" where
[code del]: "lex r = (\<Union>n. lexn r n)" -- {*Holds only between lists of the same length*}

definition
lenlex :: "('a \<times> 'a) set => ('a list \<times> 'a list) set" where
[code del]: "lenlex r = inv_image (less_than <*lex*> lex r) (\<lambda>xs. (length xs, xs))"
-- {*Compares lists by their length and then lexicographically*}

lemma wf_lexn: "wf r ==> wf (lexn r n)"
apply (induct n, simp, simp)
apply(rule wf_subset)
prefer 2 apply (rule Int_lower1)
apply(rule wf_prod_fun_image)
prefer 2 apply (rule inj_onI, auto)
done

lemma lexn_length:
"(xs, ys) : lexn r n ==> length xs = n \<and> length ys = n"
by (induct n arbitrary: xs ys) auto

lemma wf_lex [intro!]: "wf r ==> wf (lex r)"
apply (unfold lex_def)
apply (rule wf_UN)
apply (blast intro: wf_lexn, clarify)
apply (rename_tac m n)
apply (subgoal_tac "m \<noteq> n")
prefer 2 apply blast
apply (blast dest: lexn_length not_sym)
done

lemma lexn_conv:
"lexn r n =
{(xs,ys). length xs = n \<and> length ys = n \<and>
(\<exists>xys x y xs' ys'. xs= xys @ x#xs' \<and> ys= xys @ y # ys' \<and> (x, y):r)}"
apply (induct n, simp)
apply (simp add: image_Collect lex_prod_def, safe, blast)
apply (rule_tac x = "ab # xys" in exI, simp)
apply (case_tac xys, simp_all, blast)
done

lemma lex_conv:
"lex r =
{(xs,ys). length xs = length ys \<and>
(\<exists>xys x y xs' ys'. xs = xys @ x # xs' \<and> ys = xys @ y # ys' \<and> (x, y):r)}"
by (force simp add: lex_def lexn_conv)

lemma wf_lenlex [intro!]: "wf r ==> wf (lenlex r)"
by (unfold lenlex_def) blast

lemma lenlex_conv:
"lenlex r = {(xs,ys). length xs < length ys |
length xs = length ys \<and> (xs, ys) : lex r}"
by (simp add: lenlex_def Id_on_def lex_prod_def inv_image_def)

lemma Nil_notin_lex [iff]: "([], ys) \<notin> lex r"

lemma Nil2_notin_lex [iff]: "(xs, []) \<notin> lex r"

lemma Cons_in_lex [simp]:
"((x # xs, y # ys) : lex r) =
((x, y) : r \<and> length xs = length ys | x = y \<and> (xs, ys) : lex r)"
apply (rule iffI)
prefer 2 apply (blast intro: Cons_eq_appendI, clarify)
apply (case_tac xys, simp, simp)
apply blast
done

subsubsection {* Lexicographic Ordering *}

text {* Classical lexicographic ordering on lists, ie. "a" < "ab" < "b".
This ordering does \emph{not} preserve well-foundedness.
Author: N. Voelker, March 2005. *}

definition
lexord :: "('a \<times> 'a) set \<Rightarrow> ('a list \<times> 'a list) set" where
[code del]: "lexord r = {(x,y ). \<exists> a v. y = x @ a # v \<or>
(\<exists> u a b v w. (a,b) \<in> r \<and> x = u @ (a # v) \<and> y = u @ (b # w))}"

lemma lexord_Nil_left[simp]:  "([],y) \<in> lexord r = (\<exists> a x. y = a # x)"
by (unfold lexord_def, induct_tac y, auto)

lemma lexord_Nil_right[simp]: "(x,[]) \<notin> lexord r"
by (unfold lexord_def, induct_tac x, auto)

lemma lexord_cons_cons[simp]:
"((a # x, b # y) \<in> lexord r) = ((a,b)\<in> r | (a = b & (x,y)\<in> lexord r))"
apply (unfold lexord_def, safe, simp_all)
apply (case_tac u, simp, simp)
apply (case_tac u, simp, clarsimp, blast, blast, clarsimp)
apply (erule_tac x="b # u" in allE)
by force

lemmas lexord_simps = lexord_Nil_left lexord_Nil_right lexord_cons_cons

lemma lexord_append_rightI: "\<exists> b z. y = b # z \<Longrightarrow> (x, x @ y) \<in> lexord r"
by (induct_tac x, auto)

lemma lexord_append_left_rightI:
"(a,b) \<in> r \<Longrightarrow> (u @ a # x, u @ b # y) \<in> lexord r"
by (induct_tac u, auto)

lemma lexord_append_leftI: " (u,v) \<in> lexord r \<Longrightarrow> (x @ u, x @ v) \<in> lexord r"
by (induct x, auto)

lemma lexord_append_leftD:
"\<lbrakk> (x @ u, x @ v) \<in> lexord r; (! a. (a,a) \<notin> r) \<rbrakk> \<Longrightarrow> (u,v) \<in> lexord r"
by (erule rev_mp, induct_tac x, auto)

lemma lexord_take_index_conv:
"((x,y) : lexord r) =
((length x < length y \<and> take (length x) y = x) \<or>
(\<exists>i. i < min(length x)(length y) & take i x = take i y & (x!i,y!i) \<in> r))"
apply (unfold lexord_def Let_def, clarsimp)
apply (rule_tac f = "(% a b. a \<or> b)" in arg_cong2)
apply auto
apply (rule_tac x="hd (drop (length x) y)" in exI)
apply (rule_tac x="tl (drop (length x) y)" in exI)
apply (erule subst, simp add: min_def)
apply (rule_tac x ="length u" in exI, simp)
apply (rule_tac x ="take i x" in exI)
apply (rule_tac x ="x ! i" in exI)
apply (rule_tac x ="y ! i" in exI, safe)
apply (rule_tac x="drop (Suc i) x" in exI)
apply (drule sym, simp add: drop_Suc_conv_tl)
apply (rule_tac x="drop (Suc i) y" in exI)

-- {* lexord is extension of partial ordering List.lex *}
lemma lexord_lex: " (x,y) \<in> lex r = ((x,y) \<in> lexord r \<and> length x = length y)"
apply (rule_tac x = y in spec)
apply (induct_tac x, clarsimp)
by (clarify, case_tac x, simp, force)

lemma lexord_irreflexive: "(! x. (x,x) \<notin> r) \<Longrightarrow> (y,y) \<notin> lexord r"
by (induct y, auto)

lemma lexord_trans:
"\<lbrakk> (x, y) \<in> lexord r; (y, z) \<in> lexord r; trans r \<rbrakk> \<Longrightarrow> (x, z) \<in> lexord r"
apply (erule rev_mp)+
apply (rule_tac x = x in spec)
apply (rule_tac x = z in spec)
apply ( induct_tac y, simp, clarify)
apply (case_tac xa, erule ssubst)
apply (erule allE, erule allE) -- {* avoid simp recursion *}
apply (case_tac x, simp, simp)
apply (case_tac x, erule allE, erule allE, simp)
apply (erule_tac x = listb in allE)
apply (erule_tac x = lista in allE, simp)
apply (unfold trans_def)
by blast

lemma lexord_transI:  "trans r \<Longrightarrow> trans (lexord r)"
by (rule transI, drule lexord_trans, blast)

lemma lexord_linear: "(! a b. (a,b)\<in> r | a = b | (b,a) \<in> r) \<Longrightarrow> (x,y) : lexord r | x = y | (y,x) : lexord r"
apply (rule_tac x = y in spec)
apply (induct_tac x, rule allI)
apply (case_tac x, simp, simp)
apply (rule allI, case_tac x, simp, simp)
by blast

subsection {* Lexicographic combination of measure functions *}

text {* These are useful for termination proofs *}

definition
"measures fs = inv_image (lex less_than) (%a. map (%f. f a) fs)"

lemma wf_measures[recdef_wf, simp]: "wf (measures fs)"
unfolding measures_def
by blast

lemma in_measures[simp]:
"(x, y) \<in> measures [] = False"
"(x, y) \<in> measures (f # fs)
= (f x < f y \<or> (f x = f y \<and> (x, y) \<in> measures fs))"
unfolding measures_def
by auto

lemma measures_less: "f x < f y ==> (x, y) \<in> measures (f#fs)"
by simp

lemma measures_lesseq: "f x <= f y ==> (x, y) \<in> measures fs ==> (x, y) \<in> measures (f#fs)"
by auto

subsubsection {* Lifting a Relation on List Elements to the Lists *}

inductive_set
listrel :: "('a * 'a)set => ('a list * 'a list)set"
for r :: "('a * 'a)set"
where
Nil:  "([],[]) \<in> listrel r"
| Cons: "[| (x,y) \<in> r; (xs,ys) \<in> listrel r |] ==> (x#xs, y#ys) \<in> listrel r"

inductive_cases listrel_Nil1 [elim!]: "([],xs) \<in> listrel r"
inductive_cases listrel_Nil2 [elim!]: "(xs,[]) \<in> listrel r"
inductive_cases listrel_Cons1 [elim!]: "(y#ys,xs) \<in> listrel r"
inductive_cases listrel_Cons2 [elim!]: "(xs,y#ys) \<in> listrel r"

lemma listrel_mono: "r \<subseteq> s \<Longrightarrow> listrel r \<subseteq> listrel s"
apply clarify
apply (erule listrel.induct)
apply (blast intro: listrel.intros)+
done

lemma listrel_subset: "r \<subseteq> A \<times> A \<Longrightarrow> listrel r \<subseteq> lists A \<times> lists A"
apply clarify
apply (erule listrel.induct, auto)
done

lemma listrel_refl_on: "refl_on A r \<Longrightarrow> refl_on (lists A) (listrel r)"
apply (simp add: refl_on_def listrel_subset Ball_def)
apply (rule allI)
apply (induct_tac x)
apply (auto intro: listrel.intros)
done

lemma listrel_sym: "sym r \<Longrightarrow> sym (listrel r)"
apply (erule listrel.induct)
apply (blast intro: listrel.intros)+
done

lemma listrel_trans: "trans r \<Longrightarrow> trans (listrel r)"
apply (intro allI)
apply (rule impI)
apply (erule listrel.induct)
apply (blast intro: listrel.intros)+
done

theorem equiv_listrel: "equiv A r \<Longrightarrow> equiv (lists A) (listrel r)"
by (simp add: equiv_def listrel_refl_on listrel_sym listrel_trans)

lemma listrel_Nil [simp]: "listrel r  {[]} = {[]}"
by (blast intro: listrel.intros)

lemma listrel_Cons:
"listrel r  {x#xs} = set_Cons (r{x}) (listrel r  {xs})"
by (auto simp add: set_Cons_def intro: listrel.intros)

subsection {* Size function *}

lemma [measure_function]: "is_measure f \<Longrightarrow> is_measure (list_size f)"
by (rule is_measure_trivial)

lemma [measure_function]: "is_measure f \<Longrightarrow> is_measure (option_size f)"
by (rule is_measure_trivial)

lemma list_size_estimation[termination_simp]:
"x \<in> set xs \<Longrightarrow> y < f x \<Longrightarrow> y < list_size f xs"
by (induct xs) auto

lemma list_size_estimation'[termination_simp]:
"x \<in> set xs \<Longrightarrow> y \<le> f x \<Longrightarrow> y \<le> list_size f xs"
by (induct xs) auto

lemma list_size_map[simp]: "list_size f (map g xs) = list_size (f o g) xs"
by (induct xs) auto

lemma list_size_pointwise[termination_simp]:
"(\<And>x. x \<in> set xs \<Longrightarrow> f x < g x) \<Longrightarrow> list_size f xs \<le> list_size g xs"
by (induct xs) force+

subsection {* Transfer *}

definition
embed_list :: "nat list \<Rightarrow> int list"
where
"embed_list l = map int l"

definition
nat_list :: "int list \<Rightarrow> bool"
where
"nat_list l = nat_set (set l)"

definition
return_list :: "int list \<Rightarrow> nat list"
where
"return_list l = map nat l"

lemma transfer_nat_int_list_return_embed: "nat_list l \<longrightarrow>
embed_list (return_list l) = l"
unfolding embed_list_def return_list_def nat_list_def nat_set_def
apply (induct l)
apply auto
done

lemma transfer_nat_int_list_functions:
"l @ m = return_list (embed_list l @ embed_list m)"
"[] = return_list []"
unfolding return_list_def embed_list_def
apply auto
apply (induct l, auto)
apply (induct m, auto)
done

(*
lemma transfer_nat_int_fold1: "fold f l x =
fold (%x. f (nat x)) (embed_list l) x";
*)

subsection {* Code generator *}

subsubsection {* Setup *}

use "Tools/list_code.ML"

code_type list
(SML "_ list")
(OCaml "_ list")
(Scala "List[(_)]")

code_const Nil
(SML "[]")
(OCaml "[]")
(Scala "Nil")

code_instance list :: eq

code_const "eq_class.eq \<Colon> 'a\<Colon>eq list \<Rightarrow> 'a list \<Rightarrow> bool"

code_reserved SML
list

code_reserved OCaml
list

types_code
"list" ("_ list")
attach (term_of) {*
fun term_of_list f T = HOLogic.mk_list T o map f;
*}
attach (test) {*
fun gen_list' aG aT i j = frequency
[(i, fn () =>
let
val (x, t) = aG j;
val (xs, ts) = gen_list' aG aT (i-1) j
in (x :: xs, fn () => HOLogic.cons_const aT $t ()$ ts ()) end),
(1, fn () => ([], fn () => HOLogic.nil_const aT))] ()
and gen_list aG aT i = gen_list' aG aT i i;
*}

consts_code Cons ("(_ ::/ _)")

setup {*
let
fun list_codegen thy defs dep thyname b t gr =
let
val ts = HOLogic.dest_list t;
val (_, gr') = Codegen.invoke_tycodegen thy defs dep thyname false
(fastype_of t) gr;
val (ps, gr'') = fold_map
(Codegen.invoke_codegen thy defs dep thyname false) ts gr'
in SOME (Pretty.list "[" "]" ps, gr'') end handle TERM _ => NONE;
in
end
*}

subsubsection {* Generation of efficient code *}

primrec
member :: "'a \<Rightarrow> 'a list \<Rightarrow> bool" (infixl "mem" 55)
where
"x mem [] \<longleftrightarrow> False"
| "x mem (y#ys) \<longleftrightarrow> x = y \<or> x mem ys"

primrec
null:: "'a list \<Rightarrow> bool"
where
"null [] = True"
| "null (x#xs) = False"

primrec
list_inter :: "'a list \<Rightarrow> 'a list \<Rightarrow> 'a list"
where
"list_inter [] bs = []"
| "list_inter (a#as) bs =
(if a \<in> set bs then a # list_inter as bs else list_inter as bs)"

primrec
list_all :: "('a \<Rightarrow> bool) \<Rightarrow> ('a list \<Rightarrow> bool)"
where
"list_all P [] = True"
| "list_all P (x#xs) = (P x \<and> list_all P xs)"

primrec
list_ex :: "('a \<Rightarrow> bool) \<Rightarrow> 'a list \<Rightarrow> bool"
where
"list_ex P [] = False"
| "list_ex P (x#xs) = (P x \<or> list_ex P xs)"

primrec
filtermap :: "('a \<Rightarrow> 'b option) \<Rightarrow> 'a list \<Rightarrow> 'b list"
where
"filtermap f [] = []"
| "filtermap f (x#xs) =
(case f x of None \<Rightarrow> filtermap f xs
| Some y \<Rightarrow> y # filtermap f xs)"

primrec
map_filter :: "('a \<Rightarrow> 'b) \<Rightarrow> ('a \<Rightarrow> bool) \<Rightarrow> 'a list \<Rightarrow> 'b list"
where
"map_filter f P [] = []"
| "map_filter f P (x#xs) =
(if P x then f x # map_filter f P xs else map_filter f P xs)"

primrec
length_unique :: "'a list \<Rightarrow> nat"
where
"length_unique [] = 0"
| "length_unique (x#xs) =
(if x \<in> set xs then length_unique xs else Suc (length_unique xs))"

primrec
concat_map :: "('a => 'b list) => 'a list => 'b list"
where
"concat_map f [] = []"
| "concat_map f (x#xs) = f x @ concat_map f xs"

text {*
Only use @{text mem} for generating executable code.  Otherwise use
@{prop "x : set xs"} instead --- it is much easier to reason about.
The same is true for @{const list_all} and @{const list_ex}: write
@{text "\<forall>x\<in>set xs"} and @{text "\<exists>x\<in>set xs"} instead because the HOL
quantifiers are aleady known to the automatic provers. In fact, the
declarations in the code subsection make sure that @{text "\<in>"},
@{text "\<forall>x\<in>set xs"} and @{text "\<exists>x\<in>set xs"} are implemented
efficiently.

Efficient emptyness check is implemented by @{const null}.

The functions @{const filtermap} and @{const map_filter} are just
there to generate efficient code. Do not use
them for modelling and proving.
*}

lemma rev_foldl_cons [code]:
"rev xs = foldl (\<lambda>xs x. x # xs) [] xs"
proof (induct xs)
case Nil then show ?case by simp
next
case Cons
{
fix x xs ys
have "foldl (\<lambda>xs x. x # xs) ys xs @ [x]
= foldl (\<lambda>xs x. x # xs) (ys @ [x]) xs"
by (induct xs arbitrary: ys) auto
}
note aux = this
show ?case by (induct xs) (auto simp add: Cons aux)
qed

lemma mem_iff [code_post]:
"x mem xs \<longleftrightarrow> x \<in> set xs"
by (induct xs) auto

lemmas in_set_code [code_unfold] = mem_iff [symmetric]

lemma empty_null:
"xs = [] \<longleftrightarrow> null xs"
by (cases xs) simp_all

lemma [code_unfold]:
"eq_class.eq xs [] \<longleftrightarrow> null xs"

lemmas null_empty [code_post] =
empty_null [symmetric]

lemma list_inter_conv:
"set (list_inter xs ys) = set xs \<inter> set ys"
by (induct xs) auto

lemma list_all_iff [code_post]:
"list_all P xs \<longleftrightarrow> (\<forall>x \<in> set xs. P x)"
by (induct xs) auto

lemmas list_ball_code [code_unfold] = list_all_iff [symmetric]

lemma list_all_append [simp]:
"list_all P (xs @ ys) \<longleftrightarrow> (list_all P xs \<and> list_all P ys)"
by (induct xs) auto

lemma list_all_rev [simp]:
"list_all P (rev xs) \<longleftrightarrow> list_all P xs"

lemma list_all_length:
"list_all P xs \<longleftrightarrow> (\<forall>n < length xs. P (xs ! n))"
unfolding list_all_iff by (auto intro: all_nth_imp_all_set)

lemma list_ex_iff [code_post]:
"list_ex P xs \<longleftrightarrow> (\<exists>x \<in> set xs. P x)"
by (induct xs) simp_all

lemmas list_bex_code [code_unfold] =
list_ex_iff [symmetric]

lemma list_ex_length:
"list_ex P xs \<longleftrightarrow> (\<exists>n < length xs. P (xs ! n))"
unfolding list_ex_iff set_conv_nth by auto

lemma filtermap_conv:
"filtermap f xs = map (\<lambda>x. the (f x)) (filter (\<lambda>x. f x \<noteq> None) xs)"
by (induct xs) (simp_all split: option.split)

lemma map_filter_conv [simp]:
"map_filter f P xs = map f (filter P xs)"
by (induct xs) auto

lemma length_remdups_length_unique [code_unfold]:
"length (remdups xs) = length_unique xs"
by (induct xs) simp_all

lemma concat_map_code[code_unfold]:
"concat(map f xs) = concat_map f xs"
by (induct xs) simp_all

declare INFI_def [code_unfold]
declare SUPR_def [code_unfold]

declare set_map [symmetric, code_unfold]

hide (open) const length_unique

text {* Code for bounded quantification and summation over nats. *}

lemma atMost_upto [code_unfold]:
"{..n} = set [0..<Suc n]"
by auto

lemma atLeast_upt [code_unfold]:
"{..<n} = set [0..<n]"
by auto

lemma greaterThanLessThan_upt [code_unfold]:
"{n<..<m} = set [Suc n..<m]"
by auto

lemmas atLeastLessThan_upt [code_unfold] = set_upt [symmetric]

lemma greaterThanAtMost_upt [code_unfold]:
"{n<..m} = set [Suc n..<Suc m]"
by auto

lemma atLeastAtMost_upt [code_unfold]:
"{n..m} = set [n..<Suc m]"
by auto

lemma all_nat_less_eq [code_unfold]:
"(\<forall>m<n\<Colon>nat. P m) \<longleftrightarrow> (\<forall>m \<in> {0..<n}. P m)"
by auto

lemma ex_nat_less_eq [code_unfold]:
"(\<exists>m<n\<Colon>nat. P m) \<longleftrightarrow> (\<exists>m \<in> {0..<n}. P m)"
by auto

lemma all_nat_less [code_unfold]:
"(\<forall>m\<le>n\<Colon>nat. P m) \<longleftrightarrow> (\<forall>m \<in> {0..n}. P m)"
by auto

lemma ex_nat_less [code_unfold]:
"(\<exists>m\<le>n\<Colon>nat. P m) \<longleftrightarrow> (\<exists>m \<in> {0..n}. P m)"
by auto

lemma setsum_set_distinct_conv_listsum:
"distinct xs \<Longrightarrow> setsum f (set xs) = listsum (map f xs)"
by (induct xs) simp_all

lemma setsum_set_upt_conv_listsum [code_unfold]:
"setsum f (set [m..<n]) = listsum (map f [m..<n])"
by (rule setsum_set_distinct_conv_listsum) simp

text {* General equivalence between @{const listsum} and @{const setsum} *}
lemma listsum_setsum_nth:
"listsum xs = (\<Sum> i = 0 ..< length xs. xs ! i)"
using setsum_set_upt_conv_listsum[of "op ! xs" 0 "length xs"]

text {* Code for summation over ints. *}

lemma greaterThanLessThan_upto [code_unfold]:
"{i<..<j::int} = set [i+1..j - 1]"
by auto

lemma atLeastLessThan_upto [code_unfold]:
"{i..<j::int} = set [i..j - 1]"
by auto

lemma greaterThanAtMost_upto [code_unfold]:
"{i<..j::int} = set [i+1..j]"
by auto

lemmas atLeastAtMost_upto [code_unfold] = set_upto[symmetric]

lemma setsum_set_upto_conv_listsum [code_unfold]:
"setsum f (set [i..j::int]) = listsum (map f [i..j])"
by (rule setsum_set_distinct_conv_listsum) simp

text {* Optimized code for @{text"\<forall>i\<in>{a..b::int}"} and @{text"\<forall>n:{a..<b::nat}"}
and similiarly for @{text"\<exists>"}. *}

function all_from_to_nat :: "(nat \<Rightarrow> bool) \<Rightarrow> nat \<Rightarrow> nat \<Rightarrow> bool" where
"all_from_to_nat P i j =
(if i < j then if P i then all_from_to_nat P (i+1) j else False
else True)"
by auto
termination
by (relation "measure(%(P,i,j). j - i)") auto

declare all_from_to_nat.simps[simp del]

lemma all_from_to_nat_iff_ball:
"all_from_to_nat P i j = (ALL n : {i ..< j}. P n)"
proof(induct P i j rule:all_from_to_nat.induct)
case (1 P i j)
let ?yes = "i < j & P i"
show ?case
proof (cases)
assume ?yes
hence "all_from_to_nat P i j = (P i & all_from_to_nat P (i+1) j)"
also have "... = (P i & (ALL n : {i+1 ..< j}. P n))" using ?yes 1 by simp
also have "... = (ALL n : {i ..< j}. P n)" (is "?L = ?R")
proof
assume L: ?L
show ?R
proof clarify
fix n assume n: "n : {i..<j}"
show "P n"
proof cases
assume "n = i" thus "P n" using L by simp
next
assume "n ~= i"
hence "i+1 <= n" using n by auto
thus "P n" using L n by simp
qed
qed
next
assume R: ?R thus ?L using ?yes 1 by auto
qed
finally show ?thesis .
next
assume "~?yes" thus ?thesis by(auto simp add: all_from_to_nat.simps)
qed
qed

lemma list_all_iff_all_from_to_nat[code_unfold]:
"list_all P [i..<j] = all_from_to_nat P i j"

lemma list_ex_iff_not_all_from_to_not_nat[code_unfold]:
"list_ex P [i..<j] = (~all_from_to_nat (%x. ~P x) i j)"

function all_from_to_int :: "(int \<Rightarrow> bool) \<Rightarrow> int \<Rightarrow> int \<Rightarrow> bool" where
"all_from_to_int P i j =
(if i <= j then if P i then all_from_to_int P (i+1) j else False
else True)"
by auto
termination
by (relation "measure(%(P,i,j). nat(j - i + 1))") auto

declare all_from_to_int.simps[simp del]

lemma all_from_to_int_iff_ball:
"all_from_to_int P i j = (ALL n : {i .. j}. P n)"
proof(induct P i j rule:all_from_to_int.induct)
case (1 P i j)
let ?yes = "i <= j & P i"
show ?case
proof (cases)
assume ?yes
hence "all_from_to_int P i j = (P i & all_from_to_int P (i+1) j)"
also have "... = (P i & (ALL n : {i+1 .. j}. P n))" using ?yes 1 by simp
also have "... = (ALL n : {i .. j}. P n)" (is "?L = ?R")
proof
assume L: ?L
show ?R
proof clarify
fix n assume n: "n : {i..j}"
show "P n"
proof cases
assume "n = i" thus "P n" using L by simp
next
assume "n ~= i"
hence "i+1 <= n" using n by auto
thus "P n" using L n by simp
qed
qed
next
assume R: ?R thus ?L using ?yes 1 by auto
qed
finally show ?thesis .
next
assume "~?yes" thus ?thesis by(auto simp add: all_from_to_int.simps)
qed
qed

lemma list_all_iff_all_from_to_int[code_unfold]:
"list_all P [i..j] = all_from_to_int P i j"
`