source: CIVL/mods/dev.civl.com/doc/manual/part-semantics.tex@ 1aaefd4

\part{Semantics}
\label{part:semantics}

\chapter{CIVL Model Syntax}

\section{Notation and terminology}
\label{sec:notation}

Let $\B=\{\true,\false\}$ (the set of boolean values).  Let
$\N=\{0,1,2,\ldots\}$ (the set of natural numbers).

Given a node $u$ in a tree, we let $\ancestors(u)$ denote the set of
all ancestors of $u$, including $u$.  We let $\descendants(u)$ denote
the set of all descendants of $u$, including $u$.

For any set $S$, let $S^*$ denote the set of all finite sequences of
elements of $S$.  The length of a sequence $\xi\in S^*$ is denoted
$\len(\xi)$.  

% This is a lie:
% The elements of the sequence are indexed from $0$ to
% $\len(\xi)-1$.

\section{Definition of Context}
\label{sec:context}

\begin{definition}
  A \emph{CIVL type system} is a tuple comprising the following
  components:
  \begin{enumerate}
  \item a set $\Type$ (the set of \emph{types}),
  \item a type $\bool\in\Type$ (the \emph{boolean type}),
  \item a type $\proc\in\Type$ (the \emph{process-reference type}),
  \item a set $\Var$ (the set of all \emph{typed variables}),
  \item a function $\vtype\colon \Var\ra\Type$ (which gives the
    type of each variable),
  \item a set $\Val$ (the set of all \emph{values}),
  \item a function which assigns to each $t\in\Type$ a subset
    $\Val_t\subseteq\Val$ (the set of values of type $t$)
    and which satisfies $\Val_{\bool}=\B$ and $\Val_{\proc}=\N$,
  \item a function which assigns to each $t\in\Type$ a value
    $\default_t\in\Val_t$.
  \end{enumerate}
\end{definition}

The default value will be used to give an initial value to any
variable.  It could represent something like ``an undefined value of
type $t$'' or a reasonable initial value ($0$ for integers, etc.),
depending on the language one is modeling.

\begin{definition}
  Given a CIVL type system, a \emph{valuation} in that system is a
  function $\eta\colon\Var\ra\Val$ with the property that for any
  $v\in\Var$, $\eta(v)\in\Val_{\vtype(v)}$.
\end{definition}

Given a CIVL type system, we let $\Eval$ denote the set of all
valuations in that system.

\begin{definition}
  Given a CIVL type system, A \emph{CIVL expression system} for that
  type system is a tuple comprising the following components:
  \begin{enumerate}
  \item a set $\Expr$ (the set of all \emph{typed expressions} over
    $\Var$),
  \item a function $\etype\colon\Expr\ra\Type$ (giving the type
    of each expression),
  \item a function
    $\eval\colon\Expr\times\Eval\ra\Val$ (the \emph{evaluation
      function}), satisyfing
    \begin{itemize}
    \item for any $e\in\Expr$ and $\eta\in\Eval$,
      $\eval(e,\eta)\in\Val_{\etype(e)}$,
    \end{itemize}
  \item a function which associates to any $V\subseteq\Var$, a
    subset $\Expr(V)\subseteq\Expr$ (the set of
    \emph{expressions which involve only variables in $V$}) satisfying
    the following:
    \begin{itemize}
    \item for any $V\subseteq\Var$ and $\eta,\eta'\in\Eval$, if
      $\eta(v)=\eta'(v)$ for all $v\in V$, then for any $e\in\Expr(V)$,
      $\eval(e,\eta)=\eval(e,\eta')$
    \end{itemize}
  \end{enumerate}
\end{definition}

\begin{definition}
  A \emph{CIVL context} is a CIVL type system together with
  a CIVL expression system for that type system.
\end{definition}

\begin{figure}
  \notationtable
  \caption{Table of Notation Used to Define CIVL Model Syntax}
  \label{fig:notation}
\end{figure}

\section{Lexical scopes}
\label{sec:scopes}

\begin{definition}
  Given a CIVL context $\mathcal{C}$, a \emph{lexical scope system}
  over $\mathcal{C}$ is a tuple 
  \[
  (\Sigma,\rootscope,\sparent,\vars)
  \]
  consisting of
  \begin{enumerate}
  \item a set $\Sigma$ (the set of \emph{static scopes}),
  \item a scope $\rootscope\in\Sigma$ (the  \emph{root scope}),
  \item a function
    $\sparent\colon\Sigma\setminus\{\rootscope\}\rightarrow
    \Sigma$ such that 
    \[\{(\sparent(\sigma),\sigma)\mid \sigma\in\Sigma\setminus\{\rootscope\}\}\]
    gives $\Sigma$ the structure of a rooted tree with root $\rootscope$,
  \item a function $\vars\colon\Sigma\rightarrow 2^{\Var}$ 
    (specifying the variables \emph{declared} in each scope) satisfying
    \begin{itemize}
    \item $\sigma\neq\tau\implies \vars(\sigma)\cap \vars(\tau)=\emptyset$.
    \end{itemize}
  \end{enumerate}
\end{definition}

\begin{definition}
  Given a CIVL context and scope $\sigma\in\Sigma$,
  the set of \emph{visible variables} in $\sigma$
  is $\bigcup_{\sigma'\in\ancestors(\sigma)}\vars(\sigma')$.
\end{definition}

One way this notion will be used: expressions used in a scope $\sigma$
can only involve variables visible in $\sigma$.

\section{Functions}
\label{sec:functions}

Fix a CIVL context $\mathcal{C}$ and lexical scope system
\[\Lambda=(\Sigma,\rootscope,\sparent,\vars)\] over $\mathcal{C}$.

We introduce a new type symbol $\void$, as in C, to use as the return
type for a function that does not return a value.  Let
$\Type'=\Type\cup\{\void\}$.

\begin{definition}
  A \emph{function prototype} for $\Lambda$ is a tuple
  $(\sigma, t, \xi)$  consisting of
  \begin{enumerate}
  \item a scope $\sigma\in\Sigma\setminus\{\rootscope\}$
    (the \emph{function scope}),
  \item a type $t\in\Type'$ (the \emph{return type}),
  \item a finite sequence $\xi=v_1v_2\cdots v_n\in\vars(\sigma)^*$
    consisting of variables declared in the function scope
    (the \emph{formal parameters}).
  \end{enumerate}
\end{definition}

\begin{definition}
  A \emph{CIVL function prototype system} consists of
  \begin{enumerate}
  \item a set $\Func$ (the \emph{function symbols}),
  \item a function which assigns to each $f\in\Func$ a 
    function prototype, denoted
    \[
    (\fscope(f), \returntype(f), \params(f)),
    \]
    and satisfying
    \begin{itemize}
    \item for any $\sigma\in\Sigma$, there is at most
      one $f\in\Func$ such that $\sigma=\fscope(f)$, and
    \end{itemize}
  \item a \emph{root function} $f_0$ with $\fscope(f_0)=\rootscope$
    and which is the only function with root scope.
  \end{enumerate}
\end{definition}


\begin{definition}
  Given a CIVL function prototype system, and function symbol
  $f\in\Func\setminus\{f_0\}$, the \emph{declaration scope} of $f$ is
  the scope $\sigma=\sparent(\fscope(f))$.  We also write \emph{$f$ is
    declared in $\sigma$.}
\end{definition}

Note the root function $f_0$ has no declaration scope.

Just as every scope has a set of visible variables, there is also
a set of visible functions:
\begin{definition} 
  The functions \emph{visible at scope $\sigma$} are
  those declared in $\sigma$ or an ancestor of $\sigma$.
\end{definition}
We will see that the variables and functions visible at $\sigma$ are
the only variables and functions that can be referred to by statements
and expressions used within $\sigma$.

Note that only certain scopes are function scopes.  There can be
additional scopes (intuitively corresponding to block scopes in a
source program).  Every scope, however, must ``belong to'' exactly one
function.  The precise definition is as follows:
\begin{definition}
  \label{def:func}
  Given a CIVL function prototype system, define
  \[
  \func \colon \Sigma \ra \Func 
  \]
  by
  \[
  \func(\sigma)=
  \begin{cases}
    f & \text{if $\sigma=\fscope(f)$ for some $f\in\Func$}\\
    \func(\sparent(\sigma)) & \text{otherwise.}
  \end{cases}
  \]
  We say \emph{$\sigma$ belongs to $f$}  when $\func(\sigma)=f$.
\end{definition}
Note that the recursion in Definition \ref{def:func} must stop as the
root scope belongs to the root function and the scopes form a tree.


\section{Statements}

Fix a CIVL function prototype system.  A \emph{CIVL statement} is
defined to be a tuple of one of the forms described below.
In each case, we give any restritions on the components of the tuple
and a brief intuition on the statement's semantics.  The precise
semantics will be described in \S\ref{sec:semantics}.

\begin{enumerate}
\item $\langle\code{parassign},V_1,V_2,\psi\rangle$
  \begin{itemize}
  \item $V_1,V_2\subseteq\Var$
  \item $\psi\colon V_2\ra\Expr(V_1)$ satisfying
    $\etype(\psi(v))=\vtype(v)$ for all $v\in V_2$
  \item \emph{meaning}: parallel assignment, i.e., the assignment of new
    values to any or all of the variables in $V_2$. For each variable
    in $V_2$ an expression is given which will be evaluated in the old
    state to compute the new value for that variable.  $V_1$ contains
    all the variables that may be used in those expressions.  Hence
    $V_1$ is the ``read set'' and $V_2$ is the ``write set'' for the
    parallel assignment.
  \end{itemize}
\item $\langle\code{assign},v,e\rangle$
  \begin{itemize}
  \item $v\in\Var$, $e\in\Expr$, $\etype(e)=\vtype(v)$
  \item \emph{meaning}: simple assignment: evaluate an expression $e$ and
    assign result to variable $v$.  It is a special case of
    \code{parassign} but is provided for convenience.
  \end{itemize}
\item $\langle\code{call},y,f,e_1,\ldots,e_n\rangle$
  \begin{itemize}
  \item $y\in\Var$, $f\in\Func$, $e_1,\ldots,e_n\in\Expr$
  \item $n=\numparams(f)$
  \item $\etype(e_i)=\vtype(v_i)$, where $\params(f)=v_1\cdots v_n$
  \item $\returntype(f)=\vtype(y)$
  \item \emph{meaning}: evaluate expressions $e_1,\ldots,e_n$; push
    frame on call stack and move control to guarded transition system
    (see \S\ref{sec:gts}) for function $f$; when $f$ returns, pop
    stack and store returned result in $y$
  \end{itemize}
\item $\langle\code{call},f,e_1,\ldots,e_n\rangle$
  \begin{itemize}
  \item $f\in\Func$, $e_1,\ldots,e_n\in\Expr$
  \item $n=\numparams(f)$
  \item $\etype(e_i)=\vtype(v_i)$, where $\params(f)=v_1\cdots v_n$
  \item \emph{meaning}: like above, but return type may be \code{void}
    or returned value could just be ignored
  \end{itemize}
\item $\langle\code{fork},p,f,e_1,\ldots,e_n\rangle$
  \begin{itemize}
  \item $p\in\Var$, $f\in\Func$, $e_1,\ldots,e_n\in\Expr$
  \item $n=\numparams(f)$
  \item $\etype(e_i)=\vtype(v_i)$, where $\params(f)=v_1\cdots v_n$
  \item $\returntype(f)=\void$
  \item $\vtype(p)=\proc$
  \item \emph{meaning}: evaluate expressions $e_1,\ldots,e_n$;
    create new process and invoke function $f$ in it;
    return, immediately, a reference to the new process and store
    that reference in $p$
  \end{itemize}
\item $\langle\code{join},e\rangle$
  \begin{itemize}
  \item $e\in\Expr$
  \item $\etype(e)=\proc$
  \item \emph{meaning}: evaluate $e$ and wait for the referenced process to terminate
  \end{itemize}
\item $\langle\code{return},e\rangle$
  \begin{itemize}
  \item $e\in\Expr$
  \item \emph{meaning}: evaluate $e$, pop the call stack and return
    control, along with the value, to caller
  \end{itemize}
\item $\langle\code{return}\rangle$
  \begin{itemize}
  \item \emph{meaning}: pop the call stack and return control to caller;
    only to be used in functions returning \code{void}
  \end{itemize}
\item $\langle\code{write},e\rangle$
  \begin{itemize}
  \item $e\in\Expr$
  \item \emph{meaning}: evaluate $e$ and send result to output
  \end{itemize}
\item $\langle\code{noop}\rangle$
  \begin{itemize}
  \item \emph{meaning}: does nothing
  \end{itemize}
\item $\langle\code{assert}, e\rangle$
  \begin{itemize}
  \item $e\in\Expr$, $\vtype(e)=\bool$
  \item \emph{meaning}: evaluate $e$; if result is false, stop
    execution and report error
  \end{itemize}
\item  $\langle\code{assume}, e\rangle$
  \begin{itemize}
  \item $e\in\Expr$, $\vtype(e)=\bool$
  \item \emph{meaning}: assume $e$ holds (i.e., if $e$ does not hold,
    the execution sequence is not a real execution)
  \end{itemize}
\end{enumerate}

\section{Remarks}

The system described is sufficiently general to model pointers. There
can be (one or more) pointer types and corresponding values.  The
parallel assignment statement can be used to model statements like
C's \texttt{*p=e;}.  In the worst case (if no information is known
about where \texttt{p} could point), one can let $V_2=\Var$.
Similarly, expressions that involve \texttt{*p} as a right-hand
side subexpression can always take $V_1=\Var$.

Heaps can also be modeled.  A heap type may be defined and a variable
of that type declared.  Expressions to modify and read from the heap
can be defined, as can pointers into the heap.


\section{Transition system representation of functions}
\label{sec:gts}

\begin{definition}
  Given a CIVL function prototype system and $f\in\Func$,
  a \emph{guarded transition system} for $f$ 
  is a tuple $(\Loc,\lscope,\start, T)$, where
  \begin{itemize}
  \item $\Loc$ is a set (the set of \emph{locations}),
  \item $\lscope\colon\Loc\ra\Sigma$ is a function which associates
    to each $l\in\Loc$ a scope $\lscope(l)\in\Sigma$ belonging to $f$,
  \item $\start\in\Loc$ (the \emph{start location}),
  \item $T$ is a set of \emph{guarded transitions}, each of which has
    the form $\langle l,g,s,l'\rangle$, where
    \begin{itemize}
    \item $l,l'\in\Loc$ (the \emph{source} and \emph{target}
      locations)
    \item $g\in\Expr(V)$, where $V$ is the set of variables visible at
      $\lscope(l)$, and $\etype(g)=\bool$ ($g$ is called the
      \emph{guard}),
    \item $s$ is a statment all of whose constituent variables,
      expressions, and function symbols are visible at $\lscope(l)$.
    \end{itemize}
  \end{itemize}
  Furthermore, if the guarded transition system contains a statement
  of the form $\langle\code{return}\rangle$ then
  $\returntype(f)=\void$.  If it contains a statement of the form
  $\langle\code{return},e\rangle$ then
  \[
  \etype(e)=\returntype(f).
  \]
\end{definition}

\begin{definition}
  Given a CIVL prototype system, a \emph{CIVL model} $M$ for that
  system assigns, to each $f\in\Func$, a guarded transition system
  \[(\Loc_f,\lscope_f, \start_f,T_f)\] for $f$.  Moreover, if $f\neq f'$
  then
  $\Loc_f\cap\Loc_{f'}=\emptyset$.
\end{definition}

\begin{definition}
  Given a CIVL model $M$, let $\Loc=\bigcup_{f\in\Func}\Loc_f$.
\end{definition}

\chapter{CIVL Model Semantics}
\label{sec:semantics}

\section{State}
\label{sec:state}

Fix a CIVL model $M$.  Recall that a valuation is a type-respecting
function from $\Var$ to $\Val$.  Given a subset $V\subseteq\Var$ of
variables, we define a \emph{valuation on $V$} to be a type-respecting
function from $V$ to $\Val$.  Let $\Eval(V)$ denote the set of all
valuations on $V$.  Note that $\Eval(\Var)=\Eval$.

\begin{definition}
  \label{def:state}
  A \emph{state} of a CIVL model $M$ is a tuple 
  \[
  s=(\Delta, \droot, \dparent, \static, \deval, P, \stack),
  \]
  where
  \begin{enumerate}
  \item $\Delta$ is a finite set (the set of \emph{dynamic scopes} in
    $s$),
  \item $\droot\in\Delta$ (the \emph{root dynamic scope}),
  \item $\dparent\colon \Delta\setminus\{\droot\}\ra\Delta$
    is a function such that the set 
    \[
    \{(\dparent(\delta),\delta)\mid \delta\in
    \Delta\setminus\{\droot\}\}
    \]
    gives $\Delta$ the structure of a rooted tree with root $\droot$,
    \item $\static\colon\Delta\ra\Sigma$,
  \item $\static(\droot)=\rootscope$ and $\droot$ is the only
    $\delta\in\Delta$ satisfying $\static(\delta)=\rootscope$,
  \item $\static(\dparent(\delta))=\sparent(\static(\delta))$ for any
    $\delta\in\Delta$,
  \item $\deval$ is a function that assigns to each $\delta\in\Delta$
    a valuation $\deval(\delta)\in\Eval(\vars(\static(\delta)))$,
  \item $P$ (the set of \emph{process IDs} in $s$) 
    is a finite subset of $\Val_{\proc}$, and
  \item $\stack\colon P\ra \Frame^*$, where
    \[
    \Frame=\{(\delta,l)\in\Delta\times\Loc\mid\lscope(l)=\static(\delta)\}.
    \]
  \end{enumerate}
  Let $\State$ denote the set of all states of $M$.
\end{definition}

% say entrance and exit from scopes does not have to be "structured".

Remarks:
\begin{enumerate}
\item We will also refer to dynamic scopes as \emph{dyscopes}.
\item The elements of $\Delta$ contain no intrinsic information.
  Instead, all of the information concerning dyscopes is encoded
  in the functions that take elements of $\Delta$ as arguments.  Hence
  we might just as well call the elements of $\Delta$ ``dynamic scope
  IDs'' (just as we call the elements of $P$ ``process IDs'').  One
  could use natural numbers for the dyscopes, just as one does
  for processes.
\item The reason for using some form of ID for dyscopes and
  processes, rather than just incorporating the data in the
  appropriate part of the state, is that both kinds of objects may be
  shared.  There can be several components of the state that refer to
  the same dyscope $d$: e.g., $d$ could have several children,
  each of which has a parent reference to $d$, as well as a reference
  from a frame.  A process can be referred to by any number of
  variables of type $\proc$.
\item If $\sigma=\static(\delta)$, we say that \emph{$\delta$ is an
    instance of $\sigma$} or \emph{$\sigma$ is the static scope
    associated to $\delta$}.  In general, a static scope can have any
  number (including 0) of dynamic instances. The exception is the root
  scope $\rootscope$, which must have exactly one instance ($\droot$).
\item A valuation $\deval(\delta)$ assigns a value to each variable in
  the static scope associated to $\delta$.  The function $\deval$
  thereby encodes the value of all variables ``in scope'' in state
  $s$.
\item The sequence $\stack(p)$ encodes the state of the call stack of
  process $p$.  The elements of the sequence are called
  \emph{activation frames}.  The first frame in the sequence, i.e.,
  the frame in position $0$, is the bottom of the stack; the last
  frame is the top of the stack.
\item  Each frame refers to a dyscope $\delta$ and a
  location in the static scope associated to $\delta$.
\end{enumerate}


\begin{definition}
  A dyscope $\delta\in\Delta$ is a \emph{function node}
  if $\static(\delta)$ is the function scope of some function.
\end{definition}

\begin{definition}
  Given any $\delta\in\Delta$, $\fnode(\delta)\in\Delta$ is defined as
  follows: if $\delta$ is a function node, then
  $\fnode(\delta)=\delta$, else
  $\fnode(\delta)=\fnode(\dparent(\delta))$.  We call $\fnode(\delta)$
  the \emph{function node associated to $\delta$}.
\end{definition}

The relation $\{(\delta,\delta')\mid \fnode(\delta)=\fnode(\delta')\}$
is an equivalence relation $\sim$ on $\Delta$.  Let
$\bar{\Delta}=\Delta/\sim$ and write $[\delta]$ for the equivalence
class containing $\delta$.

The set of activation frames in a state $s$ may be identified with the 
set
\[
AF(s)=\bigcup_{p\in P}\{p\}\times\{0,\ldots,\len(\stack(p))-1\}
\]
Namely, $(p,i)$ corresponds to the $i^{\text{th}}$ entry in the call
stack $\stack(p)$ (where the elements of the stacks are indexed from
$0$).

Define $\Psi\colon AF(s)\ra \bar{\Delta}$ as follows: given $(p,i)$,
let $(\delta,l)$ be the corresponding frame; set $\Psi(p,i)=[\delta]$.

% \begin{definition}
%   A state $s$ is \emph{well-formed} if all of the following hold:
%   \begin{enumerate}
%   \item for any $\delta\in\Delta$, at most one child of $\delta$ is not
%     a function node,
%   \item the function $\Psi$ is a one-to-one correspondence,
%   \item any $\delta$ occurring in the top frame of a call stack
%     is a leaf node.
%   \end{enumerate}
% \end{definition}


\section{Jump protocol}
\label{sec:jump}

% can only jump if \delta is a leaf node.
% also no other frame can point to a dyscope between \delta
% and the dyscope corresponding to the function scope

% in any state, a "region" of the dyscope tree can have at
% most one (exactly one?) stack frame pointing into it.

% a region in a chain of nodes starting from a dyanmic scope corresonding
% to a function scopes and leading down until you reach another
% function scope.

% whenever you have more than one child in the dynamic tree, all but
% 0 or 1 children must be a function scope

% every dyscope is owned by at most one frame

% can a frame point only to a leaf node?  No, but all of its children
% must be function nodes

% to find out which frame owns which dyscopes:

% approach 1: start from a frame.  frame owns the node it points to.
% move up parents until you hit a function scope and stop.
% that is that frame's region.  No other frame can point into its
% region.  Proof: true in initial state, invariant under
% call and fork.

% invariant: every leaf node in the dyscope tree is pointed
% to by the top frame of the call stack of some process

% Define a \emph{well-formed state}:

% every dyscope node has at most one child which is not a function node

% 1-1 correspondence between leaf nodes and top frames of stacks.

% Define regions in the dyscope tree.   (each region contains one
% function node)


\newcommand{\lub}{\sigma_{\upsty{lub}}}

\begin{figure}[t]
  \begin{algorithm}[H]
    \Procedure{$\upsty{jump}(s\colon\State, p\colon\Val_{\proc},
      l'\colon\Loc)\colon\State$}{%
      let $(\Delta, \droot, \dparent, \static, \deval, P, \stack)=s$\;
      let $\delta$ be the dyscope of the last frame on $\stack(p)$\;
      let $\sigma=\static(\delta)$\;
      let $\sigma'=\lscope(l')$\;
      let $\lub$ be the least upper bound of $\sigma$ and
      $\sigma'$ in the tree $\Sigma$\;
      let $m$ be the minimum integer such that
      $\sparent^m(\sigma)=\lub$\;
      let $\delta_{\upsty{lub}}=\dparent^m(\delta)$\;
      let $n$ be the minimum integer such that
      $\sparent^{n}(\sigma')=\lub$\;
      let $\delta_0,\ldots,\delta_{n-1}$ be $n$ distinct objects not in $\Delta$\;
      let
      \( \displaystyle
      \Delta'=\Delta
      \cup     \{ \delta_0,\ldots,\delta_{n-1} \}
      %\setminus \{ \dparent^j(\delta)\mid 0\leq j<m\}
      \)\;
      define $\dparent'\colon\Delta'\setminus\{\droot\}\ra\Delta'$ by
      \(
      \dparent'(\delta')=
      \begin{cases}
        \dparent(\delta') & \text{if $\delta'\in\Delta$}\\
        \delta_{i+1} & \text{if $\delta'=\delta_{i}$ for some $0\leq i<n-1$}\\
        \delta_{\upsty{lub}} & \text{if $n\geq 1$ and $\delta'=\delta_{n-1}$}
      \end{cases}
      \)\;
      define $\static'\colon\Delta'\ra\Sigma$ by
      \(
      \static'(\delta')=
      \begin{cases}
        \static(\delta') & \text{if $\delta'\in\Delta$}\\
        \sparent^i(\sigma') & \text{if $\delta'=\delta_i$ for some $0\leq i<n$}
      \end{cases}
      \)\;
      for $\delta'\in\Delta'$ and $v\in\vars(\static(\delta'))$,
      let
      \(
      \deval'(\delta')(v) =
      \begin{cases}
        \deval(\delta')(v) & \text{if $\delta'\in\Delta$}\\
        \default_t & \text{otherwise}
      \end{cases}
      \)\;
      define $\stack'$ to be the same as $\stack$ except that
      the last frame on $\stack'(p)$ is replaced with
      $(\delta_0,l')$ if $n\geq 1$, or with $(\delta_{\upsty{lub}},l')$
      if $n=0$\;
      let $s'=(\Delta',\droot,\dparent',\static',\deval',P,\stack')$\;
      return the result of removing all unreachable dyscopes from $s'$\;
    }
  \end{algorithm}
  \caption{Jump protocol: how the state changes when control moves
    to a new location within a function.  The procedure may only
    be called if $\func(\sigma)=\func(\sigma')$, i.e., the jump
    is contained within one function.}
  \label{fig:jump}
\end{figure}
  
When control moves from one location to another within a function's
transition system, dyscopes may be added, because you can jump out of
scope nests and into new scope nests. The motivating idea is that you
have to move up the dyscope tree every time you move past a right
curly brace (i.e., leave a scope) and then push on a new scope for
each left curly brace you move past. So there is a sequence of upward
moves followed by a sequence of pushes to get to the new
location. (And either or both sequences could be empty.)  At the end,
if any dyscopes become unreachable, they are removed from the state.

Note however, that we do not assume that scopes are associated to
locations in a nice lexical pattern (or any pattern at all). The
protocol described here works for any arbitrary assignment of scopes
to locations.

The precise protocol is described in Figure \ref{fig:jump}.  The
algorithm shown there takes as input a well-formed state, a process
ID, and a location $l'$ for the function that $p$ is currently in.
Say the current dyscope for $p$ is $\delta$, and $l'$ is in
static scope $\sigma'$. Let $\sigma=\static(\delta)$.  Hence the
current static scope is $\sigma$ and the new static scope will be $\sigma'$.

First, you have to find the \emph{least upper bound} $\lub$ of
$\sigma$ and $\sigma'$ in the static scope tree. (Hence $\lub$ is a
common anecestor of $\sigma$ and $\sigma'$, and if $\sigma''$ is any
common ancestor of $\sigma$ and $\sigma'$ then $\sigma''$ is an
ancestor or equal to $\lub$.)  Note that the least upper bound must
exist since the function scope is a common ancestor of $\sigma$ and
$\sigma'$.  There is a chain of static scopes from $\sigma$ up to
$\lub$ and a corresponding chain
$\delta,\dparent(\delta),\ldots,\dparent^m(\delta)$ in the dynamic
scope tree.  Let $\delta_{\upsty{lub}}=\dparent^m(\delta)$.  This
will become the least upper bound of $\delta$ and the new dynamic
scope corresponding to $\sigma'$ that will be added to the state.

Next you add new dyscopes corresponding to the chain of static
scopes leading from $\lub$ down to $\sigma'$.  The variables in the
new scopes are assigned the default values for their respective types.
The $\dparent$, $\static$, and $\deval$ maps are adjusted
accordingly.  Finally, the stack is modified by replacing the last
activation frame with a frame referring to the (possibly) new dynamic
scope and new location $l'$.

This protocol is executed every time control moves from one location
to another.

Note that in CIVL all jumps stay within a function.  There is no
way to jump from one function to another (without returning).

A small variation is the protocol for moving to the start location of
a function when the function is first pushed on the stack. Since the
start location is not necessarily in the function scope (it may be a
proper descendant of that scope), you have to execute the second half
of the protocol to push a sequence of scopes from the function scope
to the scope of the start location.

\section{Initial State}

The \emph{initial state} for $M$ is obtained by creating one process
(let $P=\{0\}$) and having it call the root function $f_0$. 
Hence start with the state $s$ in which $P=\{0\}$, $\ldots$.
The initial state is $\upsty{jump}(s,0,\start_{f_0})$.

\section{Transitions}

The transitions follow the usual ``interleaving'' semantics. Given a
state $\sigma$, one defines the set of enabled transitions in $\sigma$
as follows. Let $p\in P$. Look at the last frame $(d,l)$ of
$\stack(p)$ (i.e., the top of the call stack), assuming the stack is
nonempty. Look at all guarded transitions emanating from $l$. For each
such transition, evaluate the guard using the valuation formed by
taking the union of the valuations of all ancestors of $d$ (including
$d$). In other words, follow the standard ``lexical scoping'' protocol
to determine the value of any variable that could occur at this point.
Those transitions whose guard evaluates to $\emph{true}$ are enabled.

For each enabled transition, a new state is generated by executing
the transition's statement.  For the most part, the semantics are obvious,
but there are a few details that are a bit subtle.

\section{Calls and Spawns}

Both calls and forks of a function $f$ entail the creation of a new
frame. First, a new dyscope $d$ corresponding to $\fscope(f)$ is
created. To find out where to stick that new scope in the dynamic
scope tree, proceed as follows: begin in the dyscope for the
process invoking the fork or call and start moving up its parent
sequence until you reach the first dyscope $d'$ whose associated
static scope is the defining scope of $f$. (You must reach such a
scope, or else $f$ would not be visible, and the model would have a
syntax error!) Insert $d$ right under $d'$, i.e.,
$\dparent(d)=d'$. This preserves the required correspondence between
static scopes and dyscopes. Now you move to the start location,
using the jump protocol, which may involve the creation of additional
dyscopes under $d$. The new frame references the last dynamic
scope you created, and the location is the start location of $f$.
Variables are given their initial values in all the newly created
dyscopes (however that is done).

All of that is the same whether the statement is a fork or call. The
only difference is what happens next: for a call, the new frame is
pushed onto the calling process' call stack. For a fork, a new process
is ``created'', i.e., you pick a natural number not in $P$ and
add it to $P$, and push the frame onto the new stack.   To be totally
deterministic, you could pick the least natural number not in $P$.

\section{Garbage collection}

In a state $s$, a dyscope is unreachable if there is no path
from a frame in a call stack to that dyscope (following the
$\dparent$ edges).  You can remove all unreachable dyscopes.

If a process has terminated (has empty stack) and \emph{there are no
references to that process} in the state, you can just remove the process
from the state.

In any state, you can renumber the processes (and update the
references accordingly) however you want, to get rid of gaps, put them
in a canonic order, etc.