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doc-src/Ref/thm.tex

author | paulson |

Wed, 07 Oct 1998 10:31:30 +0200 | |

changeset 5619 | 76a8c72e3fd4 |

parent 5371 | e27558a68b8d |

child 5777 | 5c0aa825c18e |

permissions | -rw-r--r-- |

new theorems

%% $Id$ \chapter{Theorems and Forward Proof} \index{theorems|(} Theorems, which represent the axioms, theorems and rules of object-logics, have type \mltydx{thm}. This chapter begins by describing operations that print theorems and that join them in forward proof. Most theorem operations are intended for advanced applications, such as programming new proof procedures. Many of these operations refer to signatures, certified terms and certified types, which have the \ML{} types {\tt Sign.sg}, {\tt cterm} and {\tt ctyp} and are discussed in Chapter~\ref{theories}. Beginning users should ignore such complexities --- and skip all but the first section of this chapter. The theorem operations do not print error messages. Instead, they raise exception~\xdx{THM}\@. Use \ttindex{print_exn} to display exceptions nicely: \begin{ttbox} allI RS mp handle e => print_exn e; {\out Exception THM raised:} {\out RSN: no unifiers -- premise 1} {\out (!!x. ?P(x)) ==> ALL x. ?P(x)} {\out [| ?P --> ?Q; ?P |] ==> ?Q} {\out} {\out uncaught exception THM} \end{ttbox} \section{Basic operations on theorems} \subsection{Pretty-printing a theorem} \index{theorems!printing of} \begin{ttbox} prth : thm -> thm prths : thm list -> thm list prthq : thm Seq.seq -> thm Seq.seq print_thm : thm -> unit print_goals : int -> thm -> unit string_of_thm : thm -> string \end{ttbox} The first three commands are for interactive use. They are identity functions that display, then return, their argument. The \ML{} identifier {\tt it} will refer to the value just displayed. The others are for use in programs. Functions with result type {\tt unit} are convenient for imperative programming. \begin{ttdescription} \item[\ttindexbold{prth} {\it thm}] prints {\it thm\/} at the terminal. \item[\ttindexbold{prths} {\it thms}] prints {\it thms}, a list of theorems. \item[\ttindexbold{prthq} {\it thmq}] prints {\it thmq}, a sequence of theorems. It is useful for inspecting the output of a tactic. \item[\ttindexbold{print_thm} {\it thm}] prints {\it thm\/} at the terminal. \item[\ttindexbold{print_goals} {\it limit\/} {\it thm}] prints {\it thm\/} in goal style, with the premises as subgoals. It prints at most {\it limit\/} subgoals. The subgoal module calls {\tt print_goals} to display proof states. \item[\ttindexbold{string_of_thm} {\it thm}] converts {\it thm\/} to a string. \end{ttdescription} \subsection{Forward proof: joining rules by resolution} \index{theorems!joining by resolution} \index{resolution}\index{forward proof} \begin{ttbox} RSN : thm * (int * thm) -> thm \hfill{\bf infix} RS : thm * thm -> thm \hfill{\bf infix} MRS : thm list * thm -> thm \hfill{\bf infix} RLN : thm list * (int * thm list) -> thm list \hfill{\bf infix} RL : thm list * thm list -> thm list \hfill{\bf infix} MRL : thm list list * thm list -> thm list \hfill{\bf infix} \end{ttbox} Joining rules together is a simple way of deriving new rules. These functions are especially useful with destruction rules. To store the result in the theorem database, use \ttindex{bind_thm} (\S\ref{ExtractingAndStoringTheProvedTheorem}). \begin{ttdescription} \item[\tt$thm@1$ RSN $(i,thm@2)$] \indexbold{*RSN} resolves the conclusion of $thm@1$ with the $i$th premise of~$thm@2$. Unless there is precisely one resolvent it raises exception \xdx{THM}; in that case, use {\tt RLN}. \item[\tt$thm@1$ RS $thm@2$] \indexbold{*RS} abbreviates \hbox{\tt$thm@1$ RSN $(1,thm@2)$}. Thus, it resolves the conclusion of $thm@1$ with the first premise of~$thm@2$. \item[\tt {$[thm@1,\ldots,thm@n]$} MRS $thm$] \indexbold{*MRS} uses {\tt RSN} to resolve $thm@i$ against premise~$i$ of $thm$, for $i=n$, \ldots,~1. This applies $thm@n$, \ldots, $thm@1$ to the first $n$ premises of $thm$. Because the theorems are used from right to left, it does not matter if the $thm@i$ create new premises. {\tt MRS} is useful for expressing proof trees. \item[\tt$thms@1$ RLN $(i,thms@2)$] \indexbold{*RLN} joins lists of theorems. For every $thm@1$ in $thms@1$ and $thm@2$ in $thms@2$, it resolves the conclusion of $thm@1$ with the $i$th premise of~$thm@2$, accumulating the results. \item[\tt$thms@1$ RL $thms@2$] \indexbold{*RL} abbreviates \hbox{\tt$thms@1$ RLN $(1,thms@2)$}. \item[\tt {$[thms@1,\ldots,thms@n]$} MRL $thms$] \indexbold{*MRL} is analogous to {\tt MRS}, but combines theorem lists rather than theorems. It too is useful for expressing proof trees. \end{ttdescription} \subsection{Expanding definitions in theorems} \index{meta-rewriting!in theorems} \begin{ttbox} rewrite_rule : thm list -> thm -> thm rewrite_goals_rule : thm list -> thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{rewrite_rule} {\it defs} {\it thm}] unfolds the {\it defs} throughout the theorem~{\it thm}. \item[\ttindexbold{rewrite_goals_rule} {\it defs} {\it thm}] unfolds the {\it defs} in the premises of~{\it thm}, but leaves the conclusion unchanged. This rule underlies \ttindex{rewrite_goals_tac}, but serves little purpose in forward proof. \end{ttdescription} \subsection{Instantiating unknowns in a theorem} \label{sec:instantiate} \index{instantiation} \begin{ttbox} read_instantiate : (string*string) list -> thm -> thm read_instantiate_sg : Sign.sg -> (string*string) list -> thm -> thm cterm_instantiate : (cterm*cterm) list -> thm -> thm instantiate' : ctyp option list -> cterm option list -> thm -> thm \end{ttbox} These meta-rules instantiate type and term unknowns in a theorem. They are occasionally useful. They can prevent difficulties with higher-order unification, and define specialized versions of rules. \begin{ttdescription} \item[\ttindexbold{read_instantiate} {\it insts} {\it thm}] processes the instantiations {\it insts} and instantiates the rule~{\it thm}. The processing of instantiations is described in \S\ref{res_inst_tac}, under {\tt res_inst_tac}. Use {\tt res_inst_tac}, not {\tt read_instantiate}, to instantiate a rule and refine a particular subgoal. The tactic allows instantiation by the subgoal's parameters, and reads the instantiations using the signature associated with the proof state. Use {\tt read_instantiate_sg} below if {\it insts\/} appears to be treated incorrectly. \item[\ttindexbold{read_instantiate_sg} {\it sg} {\it insts} {\it thm}] is like \texttt{read_instantiate {\it insts}~{\it thm}}, but it reads the instantiations under signature~{\it sg}. This is necessary to instantiate a rule from a general theory, such as first-order logic, using the notation of some specialized theory. Use the function {\tt sign_of} to get a theory's signature. \item[\ttindexbold{cterm_instantiate} {\it ctpairs} {\it thm}] is similar to {\tt read_instantiate}, but the instantiations are provided as pairs of certified terms, not as strings to be read. \item[\ttindexbold{instantiate'} {\it ctyps} {\it cterms} {\it thm}] instantiates {\it thm} according to the positional arguments {\it ctyps} and {\it cterms}. Counting from left to right, schematic variables $?x$ are either replaced by $t$ for any argument \texttt{Some\(\;t\)}, or left unchanged in case of \texttt{None} or if the end of the argument list is encountered. Types are instantiated before terms. \end{ttdescription} \subsection{Miscellaneous forward rules}\label{MiscellaneousForwardRules} \index{theorems!standardizing} \begin{ttbox} standard : thm -> thm zero_var_indexes : thm -> thm make_elim : thm -> thm rule_by_tactic : tactic -> thm -> thm rotate_prems : int -> thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{standard} $thm$] puts $thm$ into the standard form of object-rules. It discharges all meta-assumptions, replaces free variables by schematic variables, renames schematic variables to have subscript zero, also strips outer (meta) quantifiers and removes dangling sort hypotheses. \item[\ttindexbold{zero_var_indexes} $thm$] makes all schematic variables have subscript zero, renaming them to avoid clashes. \item[\ttindexbold{make_elim} $thm$] \index{rules!converting destruction to elimination} converts $thm$, a destruction rule of the form $\List{P@1;\ldots;P@m}\Imp Q$, to the elimination rule $\List{P@1; \ldots; P@m; Q\Imp R}\Imp R$. This is the basis for destruct-resolution: {\tt dresolve_tac}, etc. \item[\ttindexbold{rule_by_tactic} {\it tac} {\it thm}] applies {\it tac\/} to the {\it thm}, freezing its variables first, then yields the proof state returned by the tactic. In typical usage, the {\it thm\/} represents an instance of a rule with several premises, some with contradictory assumptions (because of the instantiation). The tactic proves those subgoals and does whatever else it can, and returns whatever is left. \item[\ttindexbold{rotate_prems} $k$ $thm$] rotates the premises of $thm$ to the left by~$k$ positions. It requires $0\leq k\leq n$, where $n$ is the number of premises; the rotation has no effect if $k$ is at either extreme. Used with \texttt{eresolve_tac}\index{*eresolve_tac!on other than first premise}, it gives the effect of applying the tactic to some other premise of $thm$ than the first. \end{ttdescription} \subsection{Taking a theorem apart} \index{theorems!taking apart} \index{flex-flex constraints} \begin{ttbox} cprop_of : thm -> cterm concl_of : thm -> term prems_of : thm -> term list cprems_of : thm -> cterm list nprems_of : thm -> int tpairs_of : thm -> (term*term) list sign_of_thm : thm -> Sign.sg theory_of_thm : thm -> theory dest_state : thm * int -> (term*term) list * term list * term * term rep_thm : thm -> {\ttlbrace}sign_ref: Sign.sg_ref, der: deriv, maxidx: int, shyps: sort list, hyps: term list, prop: term\ttrbrace crep_thm : thm -> {\ttlbrace}sign_ref: Sign.sg_ref, der: deriv, maxidx: int, shyps: sort list, hyps: cterm list, prop: cterm\ttrbrace \end{ttbox} \begin{ttdescription} \item[\ttindexbold{cprop_of} $thm$] returns the statement of $thm$ as a certified term. \item[\ttindexbold{concl_of} $thm$] returns the conclusion of $thm$ as a term. \item[\ttindexbold{prems_of} $thm$] returns the premises of $thm$ as a list of terms. \item[\ttindexbold{cprems_of} $thm$] returns the premises of $thm$ as a list of certified terms. \item[\ttindexbold{nprems_of} $thm$] returns the number of premises in $thm$, and is equivalent to {\tt length~(prems_of~$thm$)}. \item[\ttindexbold{tpairs_of} $thm$] returns the flex-flex constraints of $thm$. \item[\ttindexbold{sign_of_thm} $thm$] returns the signature associated with $thm$. \item[\ttindexbold{theory_of_thm} $thm$] returns the theory associated with $thm$. Note that this does a lookup in Isabelle's global database of loaded theories. \item[\ttindexbold{dest_state} $(thm,i)$] decomposes $thm$ as a tuple containing a list of flex-flex constraints, a list of the subgoals~1 to~$i-1$, subgoal~$i$, and the rest of the theorem (this will be an implication if there are more than $i$ subgoals). \item[\ttindexbold{rep_thm} $thm$] decomposes $thm$ as a record containing the statement of~$thm$ ({\tt prop}), its list of meta-assumptions ({\tt hyps}), its derivation ({\tt der}), a bound on the maximum subscript of its unknowns ({\tt maxidx}), and a reference to its signature ({\tt sign_ref}). The {\tt shyps} field is discussed below. \item[\ttindexbold{crep_thm} $thm$] like \texttt{rep_thm}, but returns the hypotheses and statement as certified terms. \end{ttdescription} \subsection{*Sort hypotheses} \index{sort hypotheses} \begin{ttbox} force_strip_shyps : bool ref \hfill{\bf initially true} \end{ttbox} \begin{ttdescription} \item[\ttindexbold{force_strip_shyps}] causes sort hypotheses to be deleted, printing a warning. \end{ttdescription} Isabelle's type variables are decorated with sorts, constraining them to certain ranges of types. This has little impact when sorts only serve for syntactic classification of types --- for example, FOL distinguishes between terms and other types. But when type classes are introduced through axioms, this may result in some sorts becoming {\em empty\/}: where one cannot exhibit a type belonging to it because certain sets of axioms are unsatisfiable. If a theorem contains a type variable that is constrained by an empty sort, then that theorem has no instances. It is basically an instance of {\em ex falso quodlibet}. But what if it is used to prove another theorem that no longer involves that sort? The latter theorem holds only if under an additional non-emptiness assumption. Therefore, Isabelle's theorems carry around sort hypotheses. The {\tt shyps} field is a list of sorts occurring in type variables in the current {\tt prop} and {\tt hyps} fields. It may also includes sorts used in the theorem's proof that no longer appear in the {\tt prop} or {\tt hyps} fields --- so-called {\em dangling\/} sort constraints. These are the critical ones, asserting non-emptiness of the corresponding sorts. Isabelle tries to remove extraneous sorts from the {\tt shyps} field whenever non-emptiness can be established by looking at the theorem's signature: from the {\tt arities} information, etc. Because its current implementation is highly incomplete, the flag shown above is available. Setting it to true (the default) allows existing proofs to run. \subsection{Tracing flags for unification} \index{tracing!of unification} \begin{ttbox} Unify.trace_simp : bool ref \hfill{\bf initially false} Unify.trace_types : bool ref \hfill{\bf initially false} Unify.trace_bound : int ref \hfill{\bf initially 10} Unify.search_bound : int ref \hfill{\bf initially 20} \end{ttbox} Tracing the search may be useful when higher-order unification behaves unexpectedly. Letting {\tt res_inst_tac} circumvent the problem is easier, though. \begin{ttdescription} \item[set Unify.trace_simp;] causes tracing of the simplification phase. \item[set Unify.trace_types;] generates warnings of incompleteness, when unification is not considering all possible instantiations of type unknowns. \item[Unify.trace_bound := $n$;] causes unification to print tracing information once it reaches depth~$n$. Use $n=0$ for full tracing. At the default value of~10, tracing information is almost never printed. \item[Unify.search_bound := $n$;] causes unification to limit its search to depth~$n$. Because of this bound, higher-order unification cannot return an infinite sequence, though it can return a very long one. The search rarely approaches the default value of~20. If the search is cut off, unification prints a warning \texttt{Unification bound exceeded}. \end{ttdescription} \section{*Primitive meta-level inference rules} \index{meta-rules|(} These implement the meta-logic in the style of the {\sc lcf} system, as functions from theorems to theorems. They are, rarely, useful for deriving results in the pure theory. Mainly, they are included for completeness, and most users should not bother with them. The meta-rules raise exception \xdx{THM} to signal malformed premises, incompatible signatures and similar errors. \index{meta-assumptions} The meta-logic uses natural deduction. Each theorem may depend on meta-level assumptions. Certain rules, such as $({\Imp}I)$, discharge assumptions; in most other rules, the conclusion depends on all of the assumptions of the premises. Formally, the system works with assertions of the form \[ \phi \quad [\phi@1,\ldots,\phi@n], \] where $\phi@1$,~\ldots,~$\phi@n$ are the assumptions. This can be also read as a single conclusion sequent $\phi@1,\ldots,\phi@n \vdash \phi$. Do not confuse meta-level assumptions with the object-level assumptions in a subgoal, which are represented in the meta-logic using~$\Imp$. Each theorem has a signature. Certified terms have a signature. When a rule takes several premises and certified terms, it merges the signatures to make a signature for the conclusion. This fails if the signatures are incompatible. \index{meta-implication} The {\bf implication} rules are $({\Imp}I)$ and $({\Imp}E)$: \[ \infer[({\Imp}I)]{\phi\Imp \psi}{\infer*{\psi}{[\phi]}} \qquad \infer[({\Imp}E)]{\psi}{\phi\Imp \psi & \phi} \] \index{meta-equality} Equality of truth values means logical equivalence: \[ \infer[({\equiv}I)]{\phi\equiv\psi}{\phi\Imp\psi & \psi\Imp\phi} \qquad \infer[({\equiv}E)]{\psi}{\phi\equiv \psi & \phi} \] The {\bf equality} rules are reflexivity, symmetry, and transitivity: \[ {a\equiv a}\,(refl) \qquad \infer[(sym)]{b\equiv a}{a\equiv b} \qquad \infer[(trans)]{a\equiv c}{a\equiv b & b\equiv c} \] \index{lambda calc@$\lambda$-calculus} The $\lambda$-conversions are $\alpha$-conversion, $\beta$-conversion, and extensionality:\footnote{$\alpha$-conversion holds if $y$ is not free in~$a$; $(ext)$ holds if $x$ is not free in the assumptions, $f$, or~$g$.} \[ {(\lambda x.a) \equiv (\lambda y.a[y/x])} \qquad {((\lambda x.a)(b)) \equiv a[b/x]} \qquad \infer[(ext)]{f\equiv g}{f(x) \equiv g(x)} \] The {\bf abstraction} and {\bf combination} rules let conversions be applied to subterms:\footnote{Abstraction holds if $x$ is not free in the assumptions.} \[ \infer[(abs)]{(\lambda x.a) \equiv (\lambda x.b)}{a\equiv b} \qquad \infer[(comb)]{f(a)\equiv g(b)}{f\equiv g & a\equiv b} \] \index{meta-quantifiers} The {\bf universal quantification} rules are $(\Forall I)$ and $(\Forall E)$:\footnote{$(\Forall I)$ holds if $x$ is not free in the assumptions.} \[ \infer[(\Forall I)]{\Forall x.\phi}{\phi} \qquad \infer[(\Forall E)]{\phi[b/x]}{\Forall x.\phi} \] \subsection{Assumption rule} \index{meta-assumptions} \begin{ttbox} assume: cterm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{assume} $ct$] makes the theorem \(\phi \;[\phi]\), where $\phi$ is the value of~$ct$. The rule checks that $ct$ has type $prop$ and contains no unknowns, which are not allowed in assumptions. \end{ttdescription} \subsection{Implication rules} \index{meta-implication} \begin{ttbox} implies_intr : cterm -> thm -> thm implies_intr_list : cterm list -> thm -> thm implies_intr_hyps : thm -> thm implies_elim : thm -> thm -> thm implies_elim_list : thm -> thm list -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{implies_intr} $ct$ $thm$] is $({\Imp}I)$, where $ct$ is the assumption to discharge, say~$\phi$. It maps the premise~$\psi$ to the conclusion $\phi\Imp\psi$, removing all occurrences of~$\phi$ from the assumptions. The rule checks that $ct$ has type $prop$. \item[\ttindexbold{implies_intr_list} $cts$ $thm$] applies $({\Imp}I)$ repeatedly, on every element of the list~$cts$. \item[\ttindexbold{implies_intr_hyps} $thm$] applies $({\Imp}I)$ to discharge all the hypotheses (assumptions) of~$thm$. It maps the premise $\phi \; [\phi@1,\ldots,\phi@n]$ to the conclusion $\List{\phi@1,\ldots,\phi@n}\Imp\phi$. \item[\ttindexbold{implies_elim} $thm@1$ $thm@2$] applies $({\Imp}E)$ to $thm@1$ and~$thm@2$. It maps the premises $\phi\Imp \psi$ and $\phi$ to the conclusion~$\psi$. \item[\ttindexbold{implies_elim_list} $thm$ $thms$] applies $({\Imp}E)$ repeatedly to $thm$, using each element of~$thms$ in turn. It maps the premises $\List{\phi@1,\ldots,\phi@n}\Imp\psi$ and $\phi@1$,\ldots,$\phi@n$ to the conclusion~$\psi$. \end{ttdescription} \subsection{Logical equivalence rules} \index{meta-equality} \begin{ttbox} equal_intr : thm -> thm -> thm equal_elim : thm -> thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{equal_intr} $thm@1$ $thm@2$] applies $({\equiv}I)$ to $thm@1$ and~$thm@2$. It maps the premises~$\psi$ and~$\phi$ to the conclusion~$\phi\equiv\psi$; the assumptions are those of the first premise with~$\phi$ removed, plus those of the second premise with~$\psi$ removed. \item[\ttindexbold{equal_elim} $thm@1$ $thm@2$] applies $({\equiv}E)$ to $thm@1$ and~$thm@2$. It maps the premises $\phi\equiv\psi$ and $\phi$ to the conclusion~$\psi$. \end{ttdescription} \subsection{Equality rules} \index{meta-equality} \begin{ttbox} reflexive : cterm -> thm symmetric : thm -> thm transitive : thm -> thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{reflexive} $ct$] makes the theorem \(ct\equiv ct\). \item[\ttindexbold{symmetric} $thm$] maps the premise $a\equiv b$ to the conclusion $b\equiv a$. \item[\ttindexbold{transitive} $thm@1$ $thm@2$] maps the premises $a\equiv b$ and $b\equiv c$ to the conclusion~${a\equiv c}$. \end{ttdescription} \subsection{The $\lambda$-conversion rules} \index{lambda calc@$\lambda$-calculus} \begin{ttbox} beta_conversion : cterm -> thm extensional : thm -> thm abstract_rule : string -> cterm -> thm -> thm combination : thm -> thm -> thm \end{ttbox} There is no rule for $\alpha$-conversion because Isabelle regards $\alpha$-convertible theorems as equal. \begin{ttdescription} \item[\ttindexbold{beta_conversion} $ct$] makes the theorem $((\lambda x.a)(b)) \equiv a[b/x]$, where $ct$ is the term $(\lambda x.a)(b)$. \item[\ttindexbold{extensional} $thm$] maps the premise $f(x) \equiv g(x)$ to the conclusion $f\equiv g$. Parameter~$x$ is taken from the premise. It may be an unknown or a free variable (provided it does not occur in the assumptions); it must not occur in $f$ or~$g$. \item[\ttindexbold{abstract_rule} $v$ $x$ $thm$] maps the premise $a\equiv b$ to the conclusion $(\lambda x.a) \equiv (\lambda x.b)$, abstracting over all occurrences (if any!) of~$x$. Parameter~$x$ is supplied as a cterm. It may be an unknown or a free variable (provided it does not occur in the assumptions). In the conclusion, the bound variable is named~$v$. \item[\ttindexbold{combination} $thm@1$ $thm@2$] maps the premises $f\equiv g$ and $a\equiv b$ to the conclusion~$f(a)\equiv g(b)$. \end{ttdescription} \subsection{Forall introduction rules} \index{meta-quantifiers} \begin{ttbox} forall_intr : cterm -> thm -> thm forall_intr_list : cterm list -> thm -> thm forall_intr_frees : thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{forall_intr} $x$ $thm$] applies $({\Forall}I)$, abstracting over all occurrences (if any!) of~$x$. The rule maps the premise $\phi$ to the conclusion $\Forall x.\phi$. Parameter~$x$ is supplied as a cterm. It may be an unknown or a free variable (provided it does not occur in the assumptions). \item[\ttindexbold{forall_intr_list} $xs$ $thm$] applies $({\Forall}I)$ repeatedly, on every element of the list~$xs$. \item[\ttindexbold{forall_intr_frees} $thm$] applies $({\Forall}I)$ repeatedly, generalizing over all the free variables of the premise. \end{ttdescription} \subsection{Forall elimination rules} \begin{ttbox} forall_elim : cterm -> thm -> thm forall_elim_list : cterm list -> thm -> thm forall_elim_var : int -> thm -> thm forall_elim_vars : int -> thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{forall_elim} $ct$ $thm$] applies $({\Forall}E)$, mapping the premise $\Forall x.\phi$ to the conclusion $\phi[ct/x]$. The rule checks that $ct$ and $x$ have the same type. \item[\ttindexbold{forall_elim_list} $cts$ $thm$] applies $({\Forall}E)$ repeatedly, on every element of the list~$cts$. \item[\ttindexbold{forall_elim_var} $k$ $thm$] applies $({\Forall}E)$, mapping the premise $\Forall x.\phi$ to the conclusion $\phi[\Var{x@k}/x]$. Thus, it replaces the outermost $\Forall$-bound variable by an unknown having subscript~$k$. \item[\ttindexbold{forall_elim_vars} $ks$ $thm$] applies {\tt forall_elim_var} repeatedly, for every element of the list~$ks$. \end{ttdescription} \subsection{Instantiation of unknowns} \index{instantiation} \begin{ttbox} instantiate: (indexname * ctyp){\thinspace}list * (cterm * cterm){\thinspace}list -> thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{instantiate} ($tyinsts$, $insts$) $thm$] simultaneously substitutes types for type unknowns (the $tyinsts$) and terms for term unknowns (the $insts$). Instantiations are given as $(v,t)$ pairs, where $v$ is an unknown and $t$ is a term (of the same type as $v$) or a type (of the same sort as~$v$). All the unknowns must be distinct. The rule normalizes its conclusion. Note that \ttindex{instantiate'} (see \S\ref{sec:instantiate}) provides a more convenient interface to this rule. \end{ttdescription} \subsection{Freezing/thawing type unknowns} \index{type unknowns!freezing/thawing of} \begin{ttbox} freezeT: thm -> thm varifyT: thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{freezeT} $thm$] converts all the type unknowns in $thm$ to free type variables. \item[\ttindexbold{varifyT} $thm$] converts all the free type variables in $thm$ to type unknowns. \end{ttdescription} \section{Derived rules for goal-directed proof} Most of these rules have the sole purpose of implementing particular tactics. There are few occasions for applying them directly to a theorem. \subsection{Proof by assumption} \index{meta-assumptions} \begin{ttbox} assumption : int -> thm -> thm Seq.seq eq_assumption : int -> thm -> thm \end{ttbox} \begin{ttdescription} \item[\ttindexbold{assumption} {\it i} $thm$] attempts to solve premise~$i$ of~$thm$ by assumption. \item[\ttindexbold{eq_assumption}] is like {\tt assumption} but does not use unification. \end{ttdescription} \subsection{Resolution} \index{resolution} \begin{ttbox} biresolution : bool -> (bool*thm)list -> int -> thm -> thm Seq.seq \end{ttbox} \begin{ttdescription} \item[\ttindexbold{biresolution} $match$ $rules$ $i$ $state$] performs bi-resolution on subgoal~$i$ of $state$, using the list of $\it (flag,rule)$ pairs. For each pair, it applies resolution if the flag is~{\tt false} and elim-resolution if the flag is~{\tt true}. If $match$ is~{\tt true}, the $state$ is not instantiated. \end{ttdescription} \subsection{Composition: resolution without lifting} \index{resolution!without lifting} \begin{ttbox} compose : thm * int * thm -> thm list COMP : thm * thm -> thm bicompose : bool -> bool * thm * int -> int -> thm -> thm Seq.seq \end{ttbox} In forward proof, a typical use of composition is to regard an assertion of the form $\phi\Imp\psi$ as atomic. Schematic variables are not renamed, so beware of clashes! \begin{ttdescription} \item[\ttindexbold{compose} ($thm@1$, $i$, $thm@2$)] uses $thm@1$, regarded as an atomic formula, to solve premise~$i$ of~$thm@2$. Let $thm@1$ and $thm@2$ be $\psi$ and $\List{\phi@1; \ldots; \phi@n} \Imp \phi$. For each $s$ that unifies~$\psi$ and $\phi@i$, the result list contains the theorem \[ (\List{\phi@1; \ldots; \phi@{i-1}; \phi@{i+1}; \ldots; \phi@n} \Imp \phi)s. \] \item[$thm@1$ \ttindexbold{COMP} $thm@2$] calls \hbox{\tt compose ($thm@1$, 1, $thm@2$)} and returns the result, if unique; otherwise, it raises exception~\xdx{THM}\@. It is analogous to {\tt RS}\@. For example, suppose that $thm@1$ is $a=b\Imp b=a$, a symmetry rule, and that $thm@2$ is $\List{P\Imp Q; \neg Q} \Imp\neg P$, which is the principle of contrapositives. Then the result would be the derived rule $\neg(b=a)\Imp\neg(a=b)$. \item[\ttindexbold{bicompose} $match$ ($flag$, $rule$, $m$) $i$ $state$] refines subgoal~$i$ of $state$ using $rule$, without lifting. The $rule$ is taken to have the form $\List{\psi@1; \ldots; \psi@m} \Imp \psi$, where $\psi$ need not be atomic; thus $m$ determines the number of new subgoals. If $flag$ is {\tt true} then it performs elim-resolution --- it solves the first premise of~$rule$ by assumption and deletes that assumption. If $match$ is~{\tt true}, the $state$ is not instantiated. \end{ttdescription} \subsection{Other meta-rules} \begin{ttbox} trivial : cterm -> thm lift_rule : (thm * int) -> thm -> thm rename_params_rule : string list * int -> thm -> thm flexflex_rule : thm -> thm Seq.seq \end{ttbox} \begin{ttdescription} \item[\ttindexbold{trivial} $ct$] makes the theorem \(\phi\Imp\phi\), where $\phi$ is the value of~$ct$. This is the initial state for a goal-directed proof of~$\phi$. The rule checks that $ct$ has type~$prop$. \item[\ttindexbold{lift_rule} ($state$, $i$) $rule$] \index{lifting} prepares $rule$ for resolution by lifting it over the parameters and assumptions of subgoal~$i$ of~$state$. \item[\ttindexbold{rename_params_rule} ({\it names}, {\it i}) $thm$] uses the $names$ to rename the parameters of premise~$i$ of $thm$. The names must be distinct. If there are fewer names than parameters, then the rule renames the innermost parameters and may modify the remaining ones to ensure that all the parameters are distinct. \index{parameters!renaming} \item[\ttindexbold{flexflex_rule} $thm$] \index{flex-flex constraints} removes all flex-flex pairs from $thm$ using the trivial unifier. \end{ttdescription} \index{meta-rules|)} \section{Proof objects}\label{sec:proofObjects} \index{proof objects|(} Isabelle can record the full meta-level proof of each theorem. The proof object contains all logical inferences in detail, while omitting bookkeeping steps that have no logical meaning to an outside observer. Rewriting steps are recorded in similar detail as the output of simplifier tracing. The proof object can be inspected by a separate proof-checker, for example. Full proof objects are large. They multiply storage requirements by about seven; attempts to build large logics (such as {\sc zf} and {\sc hol}) may fail. Isabelle normally builds minimal proof objects, which include only uses of oracles. You can also request an intermediate level of detail, containing uses of oracles, axioms and theorems. These smaller proof objects indicate a theorem's dependencies. Isabelle provides proof objects for the sake of transparency. Their aim is to increase your confidence in Isabelle. They let you inspect proofs constructed by the classical reasoner or simplifier, and inform you of all uses of oracles. Seldom will proof objects be given whole to an automatic proof-checker: none has been written. It is up to you to examine and interpret them sensibly. For example, when scrutinizing a theorem's derivation for dependence upon some oracle or axiom, remember to scrutinize all of its lemmas. Their proofs are included in the main derivation, through the {\tt Theorem} constructor. Proof objects are expressed using a polymorphic type of variable-branching trees. Proof objects (formally known as {\em derivations\/}) are trees labelled by rules, where {\tt rule} is a complicated datatype declared in the file {\tt Pure/thm.ML}. \begin{ttbox} datatype 'a mtree = Join of 'a * 'a mtree list; datatype rule = \(\ldots\); type deriv = rule mtree; \end{ttbox} % Each theorem's derivation is stored as the {\tt der} field of its internal record: \begin{ttbox} #der (rep_thm conjI); {\out Join (Theorem "HOL.conjI", [Join (MinProof,[])]) : deriv} \end{ttbox} This proof object identifies a labelled theorem, {\tt conjI} of theory \texttt{HOL}, whose underlying proof has not been recorded; all we have is {\tt MinProof}. Nontrivial proof objects are unreadably large and complex. Isabelle provides several functions to help you inspect them informally. These functions omit the more obscure inferences and attempt to restructure the others into natural formats, linear or tree-structured. \begin{ttbox} keep_derivs : deriv_kind ref Deriv.size : deriv -> int Deriv.drop : 'a mtree * int -> 'a mtree Deriv.linear : deriv -> deriv list Deriv.tree : deriv -> Deriv.orule mtree \end{ttbox} \begin{ttdescription} \item[\ttindexbold{keep_derivs} := MinDeriv $|$ ThmDeriv $|$ FullDeriv;] specifies one of the options for keeping derivations. They can be minimal (oracles only), include theorems and axioms, or be full. \item[\ttindexbold{Deriv.size} $der$] yields the size of a derivation, excluding lemmas. \item[\ttindexbold{Deriv.drop} ($tree$,$n$)] returns the subtree $n$ levels down, always following the first child. It is good for stripping off outer level inferences that are used to put a theorem into standard form. \item[\ttindexbold{Deriv.linear} $der$] converts a derivation into a linear format, replacing the deep nesting by a list of rules. Intuitively, this reveals the single-step Isabelle proof that is constructed internally by tactics. \item[\ttindexbold{Deriv.tree} $der$] converts a derivation into an object-level proof tree. A resolution by an object-rule is converted to a tree node labelled by that rule. Complications arise if the object-rule is itself derived in some way. Nested resolutions are unravelled, but other operations on rules (such as rewriting) are left as-is. \end{ttdescription} Functions {\tt Deriv.linear} and {\tt Deriv.tree} omit the proof of any named theorems (constructor {\tt Theorem}) they encounter in a derivation. Applying them directly to the derivation of a named theorem is therefore pointless. Use {\tt Deriv.drop} with argument~1 to skip over the initial {\tt Theorem} constructor. \index{proof objects|)} \index{theorems|)} %%% Local Variables: %%% mode: latex %%% TeX-master: "ref" %%% End: