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Commit 3f321758 authored by Jacques-Henri Jourdan's avatar Jacques-Henri Jourdan
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Merge branch 'jh/upred_alt' into 'master' 

Prove that uPred is complete even if we remove the validity restriction in uPred_closed.

See merge request FP/iris-coq!99
parents bba89517 a603fe3a
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docs/algebra.tex
View file @ 3f321758
......@@ -53,6 +53,16 @@ In particular:
The function space $(-) \nfn (-)$ is a locally non-expansive bifunctor.
Note that the composition of non-expansive (bi)functors is non-expansive, and the composition of a non-expansive and a contractive (bi)functor is contractive.
One very important OFE is the OFE of \emph{step-indexed propositions}:
For every step-index, such a proposition either holds or does not hold.
Moreover, if a propositions holds for some $n$, it also has to hold for all smaller step-indices.
\begin{align*}
\SProp \eqdef{}& \psetdown{\nat} \\
\eqdef{}& \setComp{X \in \pset{\nat}}{ \All n, m. n \geq m \Ra n \in X \Ra m \in X } \\
X \nequiv{n} Y \eqdef{}& \All m \leq n. m \in X \Lra m \in Y \\
X \nincl{n} Y \eqdef{}& \All m \leq n. m \in X \Ra m \in Y
\end{align*}
\subsection{COFE}
COFEs are \emph{complete OFEs}, which means that we can take limits of arbitrary chains.
......@@ -79,12 +89,14 @@ For once, every \emph{contractive function} $f : \ofe \to \cofeB$ where $\cofeB$
This also holds if $f^k$ is contractive for an arbitrary $k$.
Furthermore, by America and Rutten's theorem~\cite{America-Rutten:JCSS89,birkedal:metric-space}, every contractive (bi)functor from $\COFEs$ to $\COFEs$ has a unique\footnote{Uniqueness is not proven in Coq.} fixed-point.
$\SProp$ as defined above is complete, \ie it is a COFE.
\subsection{RA}
\begin{defn}
A \emph{resource algebra} (RA) is a tuple \\
$(\monoid, \mval \subseteq \monoid, \mcore{{-}}:
$(\monoid, \mvalFull : \monoid \to \mProp, \mcore{{-}}:
\monoid \to \maybe\monoid, (\mtimes) : \monoid \times \monoid \to \monoid)$ satisfying:
\begin{align*}
\All \melt, \meltB, \meltC.& (\melt \mtimes \meltB) \mtimes \meltC = \melt \mtimes (\meltB \mtimes \meltC) \tagH{ra-assoc} \\
......@@ -92,16 +104,19 @@ Furthermore, by America and Rutten's theorem~\cite{America-Rutten:JCSS89,birkeda
\All \melt.& \mcore\melt \in \monoid \Ra \mcore\melt \mtimes \melt = \melt \tagH{ra-core-id} \\
\All \melt.& \mcore\melt \in \monoid \Ra \mcore{\mcore\melt} = \mcore\melt \tagH{ra-core-idem} \\
\All \melt, \meltB.& \mcore\melt \in \monoid \land \melt \mincl \meltB \Ra \mcore\meltB \in \monoid \land \mcore\melt \mincl \mcore\meltB \tagH{ra-core-mono} \\
\All \melt, \meltB.& (\melt \mtimes \meltB) \in \mval \Ra \melt \in \mval \tagH{ra-valid-op} \\
\All \melt, \meltB.& \mvalFull(\melt \mtimes \meltB) \Ra \mvalFull(\melt) \tagH{ra-valid-op} \\
\text{where}\qquad %\qquad\\
\maybe\monoid \eqdef{}& \monoid \uplus \set{\mnocore} \qquad\qquad\qquad \melt^? \mtimes \mnocore \eqdef \mnocore \mtimes \melt^? \eqdef \melt^? \\
\melt \mincl \meltB \eqdef{}& \Exists \meltC \in \monoid. \meltB = \melt \mtimes \meltC \tagH{ra-incl}
\end{align*}
\end{defn}
\noindent
Here, $\mProp$ is the set of (meta-level) propositions.
Think of \texttt{Prop} in Coq or $\mathbb{B}$ in classical mathematics.
RAs are closely related to \emph{Partial Commutative Monoids} (PCMs), with two key differences:
\begin{enumerate}
\item The composition operation on RAs is total (as opposed to the partial composition operation of a PCM), but there is a specific subset $\mval$ of \emph{valid} elements that is compatible with the composition operation (\ruleref{ra-valid-op}).
\item The composition operation on RAs is total (as opposed to the partial composition operation of a PCM), but there is a specific subset of \emph{valid} elements that is compatible with the composition operation (\ruleref{ra-valid-op}).
These valid elements are identified by the \emph{validity predicate} $\mvalFull$.
This take on partiality is necessary when defining the structure of \emph{higher-order} ghost state, CMRAs, in the next subsection.
......@@ -122,7 +137,7 @@ Notice also that the core of an RA is a strict generalization of the unit that a
\begin{defn}
It is possible to do a \emph{frame-preserving update} from $\melt \in \monoid$ to $\meltsB \subseteq \monoid$, written $\melt \mupd \meltsB$, if
\[ \All \maybe{\melt_\f} \in \maybe\monoid. \melt \mtimes \maybe{\melt_\f} \in \mval \Ra \Exists \meltB \in \meltsB. \meltB \mtimes \maybe{\melt_\f} \in \mval \]
\[ \All \maybe{\melt_\f} \in \maybe\monoid. \melt \mtimes \mvalFull(\maybe{\melt_\f}) \Ra \Exists \meltB \in \meltsB. \meltB \mtimes \mvalFull(\maybe{\melt_\f}) \]
We further define $\melt \mupd \meltB \eqdef \melt \mupd \set\meltB$.
\end{defn}
......@@ -134,17 +149,15 @@ Since Iris ensures that the global ghost state is valid, this means that we can
\subsection{CMRA}
\begin{defn}
A \emph{CMRA} is a tuple $(\monoid : \OFEs, (\mval_n \subseteq \monoid)_{n \in \nat},\\ \mcore{{-}}: \monoid \nfn \maybe\monoid, (\mtimes) : \monoid \times \monoid \nfn \monoid)$ satisfying:
A \emph{CMRA} is a tuple $(\monoid : \OFEs, \mval : \monoid \nfn \SProp, \mcore{{-}}: \monoid \nfn \maybe\monoid,\\ (\mtimes) : \monoid \times \monoid \nfn \monoid)$ satisfying:
\begin{align*}
\All n, \melt, \meltB.& \melt \nequiv{n} \meltB \land \melt\in\mval_n \Ra \meltB\in\mval_n \tagH{cmra-valid-ne} \\
\All n, m.& n \geq m \Ra \mval_n \subseteq \mval_m \tagH{cmra-valid-mono} \\
\All \melt, \meltB, \meltC.& (\melt \mtimes \meltB) \mtimes \meltC = \melt \mtimes (\meltB \mtimes \meltC) \tagH{cmra-assoc} \\
\All \melt, \meltB.& \melt \mtimes \meltB = \meltB \mtimes \melt \tagH{cmra-comm} \\
\All \melt.& \mcore\melt \in \monoid \Ra \mcore\melt \mtimes \melt = \melt \tagH{cmra-core-id} \\
\All \melt.& \mcore\melt \in \monoid \Ra \mcore{\mcore\melt} = \mcore\melt \tagH{cmra-core-idem} \\
\All \melt, \meltB.& \mcore\melt \in \monoid \land \melt \mincl \meltB \Ra \mcore\meltB \in \monoid \land \mcore\melt \mincl \mcore\meltB \tagH{cmra-core-mono} \\
\All n, \melt, \meltB.& (\melt \mtimes \meltB) \in \mval_n \Ra \melt \in \mval_n \tagH{cmra-valid-op} \\
\All n, \melt, \meltB_1, \meltB_2.& \omit\rlap{$\melt \in \mval_n \land \melt \nequiv{n} \meltB_1 \mtimes \meltB_2 \Ra {}$} \\
\All \melt, \meltB.& \mval(\melt \mtimes \meltB) \subseteq \mval(\melt) \tagH{cmra-valid-op} \\
\All n, \melt, \meltB_1, \meltB_2.& \omit\rlap{$n \in \mval(\melt) \land \melt \nequiv{n} \meltB_1 \mtimes \meltB_2 \Ra {}$} \\
&\Exists \meltC_1, \meltC_2. \melt = \meltC_1 \mtimes \meltC_2 \land \meltC_1 \nequiv{n} \meltB_1 \land \meltC_2 \nequiv{n} \meltB_2 \tagH{cmra-extend} \\
\text{where}\qquad\qquad\\
\melt \mincl \meltB \eqdef{}& \Exists \meltC. \meltB = \melt \mtimes \meltC \tagH{cmra-incl} \\
......@@ -154,8 +167,8 @@ Since Iris ensures that the global ghost state is valid, this means that we can
This is a natural generalization of RAs over OFEs.
All operations have to be non-expansive, and the validity predicate $\mval$ can now also depend on the step-index.
We define the plain $\mval$ as the ``limit'' of the $\mval_n$:
\[ \mval \eqdef \bigcap_{n \in \nat} \mval_n \]
We define the plain $\mvalFull$ as the ``limit'' of the step-indexed approximation:
\[ \mvalFull(\melt) \eqdef \All n. n \in \mval(\melt) \]
\paragraph{The extension axiom (\ruleref{cmra-extend}).}
Notice that the existential quantification in this axiom is \emph{constructive}, \ie it is a sigma type in Coq.
......@@ -184,7 +197,7 @@ This operation is needed to prove that $\later$ commutes with separating conjunc
\begin{defn}
An element $\munit$ of a CMRA $\monoid$ is called the \emph{unit} of $\monoid$ if it satisfies the following conditions:
\begin{enumerate}[itemsep=0pt]
\item $\munit$ is valid: \\ $\All n. \munit \in \mval_n$
\item $\munit$ is valid: \\ $\All n. n \in \mval(\munit)$
\item $\munit$ is a left-identity of the operation: \\
$\All \melt \in M. \munit \mtimes \melt = \melt$
\item $\munit$ is its own core: \\ $\mcore\munit = \munit$
......@@ -197,7 +210,7 @@ This operation is needed to prove that $\later$ commutes with separating conjunc
\begin{defn}
It is possible to do a \emph{frame-preserving update} from $\melt \in \monoid$ to $\meltsB \subseteq \monoid$, written $\melt \mupd \meltsB$, if
\[ \All n, \maybe{\melt_\f}. \melt \mtimes \maybe{\melt_\f} \in \mval_n \Ra \Exists \meltB \in \meltsB. \meltB \mtimes \maybe{\melt_\f} \in \mval_n \]
\[ \All n, \maybe{\melt_\f}. n \in \mval(\melt \mtimes \maybe{\melt_\f}) \Ra \Exists \meltB \in \meltsB. n \in\mval(\meltB \mtimes \maybe{\melt_\f}) \]
We further define $\melt \mupd \meltB \eqdef \melt \mupd \set\meltB$.
\end{defn}
......@@ -208,7 +221,7 @@ Note that for RAs, this and the RA-based definition of a frame-preserving update
\begin{enumerate}[itemsep=0pt]
\item $\monoid$ is a discrete COFE
\item $\mval$ ignores the step-index: \\
$\All \melt \in \monoid. \melt \in \mval_0 \Ra \All n, \melt \in \mval_n$
$\All \melt \in \monoid. 0 \in \mval(\melt) \Ra \All n. n \in \mval(\melt)$
\end{enumerate}
\end{defn}
Note that every RA is a discrete CMRA, by picking the discrete COFE for the equivalence relation.
......@@ -223,7 +236,7 @@ Furthermore, discrete CMRAs can be turned into RAs by ignoring their COFE struct
\item $f$ commutes with the core:\\
$\All \melt \in \monoid_1. \mcore{f(\melt)} = f(\mcore{\melt})$
\item $f$ preserves validity: \\
$\All n, \melt \in \monoid_1. \melt \in \mval_n \Ra f(\melt) \in \mval_n$
$\All n, \melt \in \monoid_1. n \in \mval(\melt) \Ra n \in \mval(f(\melt))$
\end{enumerate}
\end{defn}
......
docs/constructions.tex
View file @ 3f321758
......@@ -21,32 +21,32 @@ $\latert(-)$ is a locally \emph{contractive} functor from $\OFEs$ to $\OFEs$.
Given a CMRA $\monoid$, we define the COFE $\UPred(\monoid)$ of \emph{uniform predicates} over $\monoid$ as follows:
\begin{align*}
\UPred(\monoid) \eqdef{} \setComp{\pred: \nat \times \monoid \to \mProp}{
\begin{inbox}[c]
(\All n, x, y. \pred(n, x) \land x \nequiv{n} y \Ra \pred(n, y)) \land {}\\
(\All n, m, x, y. \pred(n, x) \land x \mincl y \land m \leq n \land y \in \mval_m \Ra \pred(m, y))
\end{inbox}
}
\monoid \monnra \SProp \eqdef{}& \setComp{\pred: \monoid \nfn \SProp}
{\All n, \melt, \meltB. \melt \mincl[n] \meltB \Ra \pred(\melt) \nincl{n} \pred(\meltB)} \\
\UPred(\monoid) \eqdef{}& \faktor{\monoid \monnra \SProp}{\equiv} \\
\pred \equiv \predB \eqdef{}& \All m, \melt. m \in \mval(\melt) \Ra (m \in \pred(\melt) \iff m \in \predB(\melt)) \\
\pred \nequiv{n} \predB \eqdef{}& \All m \le n, \melt. m \in \mval(\melt) \Ra (m \in \pred(\melt) \iff m \in \predB(\melt))
\end{align*}
where $\mProp$ is the set of meta-level propositions, \eg Coq's \texttt{Prop}.
You can think of uniform predicates as monotone, step-indexed predicates over a CMRA that ``ignore'' invalid elements (as defined by the quotient).
$\UPred(-)$ is a locally non-expansive functor from $\CMRAs$ to $\COFEs$.
One way to understand this definition is to re-write it a little.
We start by defining the COFE of \emph{step-indexed propositions}: For every step-index, the proposition either holds or does not hold.
\begin{align*}
\SProp \eqdef{}& \psetdown{\nat} \\
\eqdef{}& \setComp{X \in \pset{\nat}}{ \All n, m. n \geq m \Ra n \in X \Ra m \in X } \\
X \nequiv{n} Y \eqdef{}& \All m \leq n. m \in X \Lra m \in Y
\end{align*}
Notice that this notion of $\SProp$ is already hidden in the validity predicate $\mval_n$ of a CMRA:
We could equivalently require every CMRA to define $\mval_{-}(-) : \monoid \nfn \SProp$, replacing \ruleref{cmra-valid-ne} and \ruleref{cmra-valid-mono}.
It is worth noting that the above quotient admits canonical
representatives. More precisely, one can show that every
equivalence class contains exactly one element $P_0$ such that:
\[ \All n, \melt. (\mval(\melt) \nincl{n} P_0(\melt)) \Ra n \in P_0(\melt) \tagH{UPred-canonical} \]
Intuitively, this says that $P_0$ trivially holds whenever the resource is invalid.
Starting from any element $P$, one can find this canonical
representative by choosing $P_0(\melt) := \setComp{n}{n \in \mval(\melt) \Ra n \in P(\melt)}$.
Hence, as an alternative definition of $\UPred$, we could use the set
of canonical representatives. This alternative definition would
save us from using a quotient. However, the definitions of the various
connectives would get more complicated, because we have to make sure
they all verify \ruleref{UPred-canonical}, which sometimes requires some adjustments. We
would moreover need to prove one more property for every logical
connective.
Now we can rewrite $\UPred(\monoid)$ as monotone step-indexed predicates over $\monoid$, where the definition of a ``monotone'' function here is a little funny.
\begin{align*}
\UPred(\monoid) \cong{}& \monoid \monra \SProp \\
\eqdef{}& \setComp{\pred: \monoid \nfn \SProp}{\All n, m, x, y. n \in \pred(x) \land x \mincl y \land m \leq n \land y \in \mval_m \Ra m \in \pred(y)}
\end{align*}
The reason we chose the first definition is that it is easier to work with in Coq.
\clearpage
\section{RA and CMRA constructions}
......@@ -69,16 +69,16 @@ Frame-preserving updates on the $M_i$ lift to the product:
The \emph{sum CMRA} $\monoid_1 \csumm \monoid_2$ for any CMRAs $\monoid_1$ and $\monoid_2$ is defined as (again, we use a datatype-like notation):
\begin{align*}
\monoid_1 \csumm \monoid_2 \eqdef{}& \cinl(\melt_1:\monoid_1) \mid \cinr(\melt_2:\monoid_2) \mid \mundef \\
\mval_n \eqdef{}& \setComp{\cinl(\melt_1)}{\melt_1 \in \mval'_n}
\cup \setComp{\cinr(\melt_2)}{\melt_2 \in \mval''_n} \\
\mval(\mundef) \eqdef{}& \emptyset \\
\mval(\cinl(\melt)) \eqdef{}& \mval_1(\melt) \\
\cinl(\melt_1) \mtimes \cinl(\meltB_1) \eqdef{}& \cinl(\melt_1 \mtimes \meltB_1) \\
% \munit \mtimes \ospending \eqdef{}& \ospending \mtimes \munit \eqdef \ospending \\
% \munit \mtimes \osshot(\melt) \eqdef{}& \osshot(\melt) \mtimes \munit \eqdef \osshot(\melt) \\
\mcore{\cinl(\melt_1)} \eqdef{}& \begin{cases}\mnocore & \text{if $\mcore{\melt_1} = \mnocore$} \\ \cinl({\mcore{\melt_1}}) & \text{otherwise} \end{cases}
\end{align*}
The composition and core for $\cinr$ are defined symmetrically.
Above, $\mval_1$ refers to the validity of $\monoid_1$.
The validity, composition and core for $\cinr$ are defined symmetrically.
The remaining cases of the composition and core are all $\mundef$.
Above, $\mval'$ refers to the validity of $\monoid_1$, and $\mval''$ to the validity of $\monoid_2$.
Notice that we added the artificial ``invalid'' (or ``undefined'') element $\mundef$ to this CMRA just in order to make certain compositions of elements (in this case, $\cinl$ and $\cinr$) invalid.
......@@ -99,7 +99,7 @@ We obtain the following frame-preserving updates, as well as their symmetric cou
{\cinl(\melt) \mupd \setComp{ \cinl(\meltB)}{\meltB \in \meltsB}}
\inferH{sum-swap}
{\All \melt_\f, n. \melt \mtimes \melt_\f \notin \mval'_n \and \meltB \in \mval''}
{\All \melt_\f \in M, n. n \notin \mval(\melt \mtimes \melt_\f) \and \mvalFull(\meltB)}
{\cinl(\melt) \mupd \cinr(\meltB)}
\end{mathpar}
Crucially, the second rule allows us to \emph{swap} the ``side'' of the sum that the CMRA is on if $\mval$ has \emph{no possible frame}.
......@@ -122,18 +122,18 @@ Given some infinite countable $K$ and some CMRA $\monoid$, the set of finite par
We obtain the following frame-preserving updates:
\begin{mathpar}
\inferH{fpfn-alloc-strong}
{\text{$G$ infinite} \and \melt \in \mval}
{\text{$G$ infinite} \and \mvalFull(\melt)}
{\emptyset \mupd \setComp{\mapsingleton \gname \melt}{\gname \in G}}
\inferH{fpfn-alloc}
{\melt \in \mval}
{\mvalFull(\melt)}
{\emptyset \mupd \setComp{\mapsingleton \gname \melt}{\gname \in K}}
\inferH{fpfn-update}
{\melt \mupd_\monoid \meltsB}
{\mapinsert i \melt f] \mupd \setComp{ \mapinsert i \meltB f}{\meltB \in \meltsB}}
\end{mathpar}
Above, $\mval$ refers to the validity of $\monoid$.
Above, $\mvalFull$ refers to the (full) validity of $\monoid$.
$K \fpfn (-)$ is a locally non-expansive functor from $\CMRAs$ to $\CMRAs$.
......@@ -146,7 +146,7 @@ Given some OFE $\cofe$, we define the CMRA $\agm(\cofe)$ as follows:
\textnormal{where }& \melt \sim \meltB \eqdef{} \All n. \melt \nequiv{n} \meltB \\
~\\
% \All n \in {\melt.V}.\, \melt.x \nequiv{n} \meltB.x \\
\mval_n \eqdef{}& \setComp{\melt \in \agm(\cofe)}{ \All x, y \in \melt. x \nequiv{n} y } \\
\mval(\melt) \eqdef{}& \setComp{n}{ \All x, y \in \melt. x \nequiv{n} y } \\
\mcore\melt \eqdef{}& \melt \\
\melt \mtimes \meltB \eqdef{}& \melt \cup \meltB
\end{align*}
......@@ -158,11 +158,11 @@ We define a non-expansive injection $\aginj$ into $\agm(\cofe)$ as follows:
\[ \aginj(x) \eqdef \set{x} \]
There are no interesting frame-preserving updates for $\agm(\cofe)$, but we can show the following:
\begin{mathpar}
\axiomH{ag-val}{\aginj(x) \in \mval_n}
\axiomH{ag-val}{\mvalFull(\aginj(x))}
\axiomH{ag-dup}{\aginj(x) = \aginj(x)\mtimes\aginj(x)}
\axiomH{ag-agree}{\aginj(x) \mtimes \aginj(y) \in \mval_n \Lra x \nequiv{n} y}
\axiomH{ag-agree}{n \in \mval(\aginj(x) \mtimes \aginj(y)) \Ra x \nequiv{n} y}
\end{mathpar}
......@@ -171,7 +171,7 @@ There are no interesting frame-preserving updates for $\agm(\cofe)$, but we can
Given an OFE $\cofe$, we define a CMRA $\exm(\cofe)$ such that at most one $x \in \cofe$ can be owned:
\begin{align*}
\exm(\cofe) \eqdef{}& \exinj(\cofe) \mid \mundef \\
\mval_n \eqdef{}& \setComp{\melt\in\exm(\cofe)}{\melt \neq \mundef}
\mval(\melt) \eqdef{}& \setComp{n}{\melt \neq \mundef}
\end{align*}
All cases of composition go to $\mundef$.
\begin{align*}
......@@ -281,7 +281,7 @@ We assume that $M$ has a unit $\munit$, and hence its core is total.
(If $M$ is an exclusive monoid, the construction is very similar to a half-ownership monoid with two asymmetric halves.)
\begin{align*}
\authm(M) \eqdef{}& \maybe{\exm(M)} \times M \\
\mval_n \eqdef{}& \setComp{ (x, \meltB) \in \authm(M) }{ \meltB \in \mval_n \land (x = \mnocore \lor \Exists \melt. x = \exinj(\melt) \land \meltB \mincl_n \melt) } \\
\mval( (x, \meltB ) ) \eqdef{}& \setComp{ n }{ n \in \mval(\meltB) \land (x = \mnocore \lor \Exists \melt. x = \exinj(\melt) \land \meltB \mincl_n \melt) } \\
(x_1, \meltB_1) \mtimes (x_2, \meltB_2) \eqdef{}& (x_1 \mtimes x_2, \meltB_2 \mtimes \meltB_2) \\
\mcore{(x, \meltB)} \eqdef{}& (\mnocore, \mcore\meltB) \\
(x_1, \meltB_1) \nequiv{n} (x_2, \meltB_2) \eqdef{}& x_1 \nequiv{n} x_2 \land \meltB_1 \nequiv{n} \meltB_2
......@@ -295,7 +295,7 @@ The frame-preserving update involves the notion of a \emph{local update}:
\newcommand\lupd{\stackrel{\mathrm l}{\mupd}}
\begin{defn}
It is possible to do a \emph{local update} from $\melt_1$ and $\meltB_1$ to $\melt_2$ and $\meltB_2$, written $(\melt_1, \meltB_1) \lupd (\melt_2, \meltB_2)$, if
\[ \All n, \maybe{\melt_\f}. \melt_1 \in \mval_n \land \melt_1 \nequiv{n} \meltB_1 \mtimes \maybe{\melt_\f} \Ra \melt_2 \in \mval_n \land \melt_2 \nequiv{n} \meltB_2 \mtimes \maybe{\melt_\f} \]
\[ \All n, \maybe{\melt_\f}. n \in \mval(\melt_1) \land \melt_1 \nequiv{n} \meltB_1 \mtimes \maybe{\melt_\f} \Ra n \in \mval(\melt_2) \land \melt_2 \nequiv{n} \meltB_2 \mtimes \maybe{\melt_\f} \]
\end{defn}
In other words, the idea is that for every possible frame $\maybe{\melt_\f}$ completing $\meltB_1$ to $\melt_1$, the same frame also completes $\meltB_2$ to $\melt_2$.
......@@ -327,7 +327,7 @@ We further define \emph{closed} sets of states (given a particular set of tokens
The STS RA is defined as follows
\begin{align*}
\monoid \eqdef{}& \STSauth(s:\STSS, T:\wp(\STST) \mid \STSL(s) \disj T) \mid{}\\& \STSfrag(S: \wp(\STSS), T: \wp(\STST) \mid \STSclsd(S, T) \land S \neq \emptyset) \mid \mundef \\
\mval \eqdef{}& \setComp{\melt\in\monoid}{\melt \neq \mundef} \\
\mvalFull(\melt) \eqdef{}& \melt \neq \mundef \\
\STSfrag(S_1, T_1) \mtimes \STSfrag(S_2, T_2) \eqdef{}& \STSfrag(S_1 \cap S_2, T_1 \cup T_2) \qquad\qquad\qquad \text{if $T_1 \disj T_2$ and $S_1 \cap S_2 \neq \emptyset$} \\
\STSfrag(S, T) \mtimes \STSauth(s, T') \eqdef{}& \STSauth(s, T') \mtimes \STSfrag(S, T) \eqdef \STSauth(s, T \cup T') \qquad \text{if $T \disj T'$ and $s \in S$} \\
\mcore{\STSfrag(S, T)} \eqdef{}& \STSfrag(\upclose(S, \emptyset), \emptyset) \\
......
docs/iris.sty
View file @ 3f321758
......@@ -36,7 +36,7 @@
\newcommand{\upclose}{\mathord{\uparrow}}
\newcommand{\ALT}{\ |\ }
\newcommand{\spac}{\,} % a space
\newcommand{\spac}{\hskip 0.2em plus 0.1em} % a space
\def\All #1.{\forall #1.\spac}%
\def\Exists #1.{\exists #1.\spac}%
......@@ -117,6 +117,7 @@
\newcommand{\wtt}[2]{#1 : #2} % well-typed term
\newcommand{\nequiv}[1]{\ensuremath{\mathrel{\stackrel{#1}{=}}}}
\newcommand{\nincl}[1]{\ensuremath{\mathrel{\stackrel{#1}{\subseteq}}}}
\newcommand{\notnequiv}[1]{\ensuremath{\mathrel{\stackrel{#1}{\neq}}}}
\newcommand{\nequivset}[2]{\ensuremath{\mathrel{\stackrel{#1}{=}_{#2}}}}
\newcommand{\nequivB}[1]{\ensuremath{\mathrel{\stackrel{#1}{\equiv}}}}
......
docs/model.tex
View file @ 3f321758
......@@ -42,7 +42,7 @@ We are thus going to define the assertions as mapping CMRA elements to sets of s
\Lam \melt. \Sem{\vctx \proves \prop : \Prop}_\gamma(\melt) \cup \Sem{\vctx \proves \propB : \Prop}_\gamma(\melt) \\
\Sem{\vctx \proves \prop \Ra \propB : \Prop}_\gamma &\eqdef
\Lam \melt. \setComp{n}{\begin{aligned}
\All m, \meltB.& m \leq n \land \melt \mincl \meltB \land \meltB \in \mval_m \Ra {} \\
\All m, \meltB.& m \leq n \land \melt \mincl \meltB \land m \in \mval(\meltB) \Ra {} \\
& m \in \Sem{\vctx \proves \prop : \Prop}_\gamma(\meltB) \Ra {}\\& m \in \Sem{\vctx \proves \propB : \Prop}_\gamma(\meltB)\end{aligned}}\\
\Sem{\vctx \proves \All \var : \type. \prop : \Prop}_\gamma &\eqdef
\Lam \melt. \setComp{n}{ \All v \in \Sem{\type}. n \in \Sem{\vctx, \var : \type \proves \prop : \Prop}_{\mapinsert \var v \gamma}(\melt) } \\
......@@ -54,15 +54,15 @@ We are thus going to define the assertions as mapping CMRA elements to sets of s
\\
\Sem{\vctx \proves \prop \wand \propB : \Prop}_\gamma &\eqdef
\Lam \melt. \setComp{n}{\begin{aligned}
\All m, \meltB.& m \leq n \land \melt\mtimes\meltB \in \mval_m \Ra {} \\
\All m, \meltB.& m \leq n \land m \in \mval(\melt\mtimes\meltB) \Ra {} \\
& m \in \Sem{\vctx \proves \prop : \Prop}_\gamma(\meltB) \Ra {}\\& m \in \Sem{\vctx \proves \propB : \Prop}_\gamma(\melt\mtimes\meltB)\end{aligned}} \\
\Sem{\vctx \proves \ownM{\term} : \Prop}_\gamma &\eqdef \Lam\meltB. \setComp{n}{\Sem{\vctx \proves \term : \textlog{M}}_\gamma \mincl[n] \meltB} \\
\Sem{\vctx \proves \mval(\term) : \Prop}_\gamma &\eqdef \Lam\any. \setComp{n}{\Sem{\vctx \proves \term : \textlog{M}}_\gamma \in \mval_n} \\
\Sem{\vctx \proves \mval(\term) : \Prop}_\gamma &\eqdef \Lam\any. \mval(\Sem{\vctx \proves \term : \textlog{M}}_\gamma) \\
\Sem{\vctx \proves \always{\prop} : \Prop}_\gamma &\eqdef \Lam\melt. \Sem{\vctx \proves \prop : \Prop}_\gamma(\mcore\melt) \\
\Sem{\vctx \proves \plainly{\prop} : \Prop}_\gamma &\eqdef \Lam\melt. \Sem{\vctx \proves \prop : \Prop}_\gamma(\munit) \\
\Sem{\vctx \proves \later{\prop} : \Prop}_\gamma &\eqdef \Lam\melt. \setComp{n}{n = 0 \lor n-1 \in \Sem{\vctx \proves \prop : \Prop}_\gamma(\melt)}\\
\Sem{\vctx \proves \upd\prop : \Prop}_\gamma &\eqdef \Lam\melt. \setComp{n}{\begin{aligned}
\All m, \melt'. & m \leq n \land (\melt \mtimes \melt') \in \mval_m \Ra {}\\& \Exists \meltB. (\meltB \mtimes \melt') \in \mval_m \land m \in \Sem{\vctx \proves \prop :\Prop}_\gamma(\meltB)
\All m, \melt'. & m \leq n \land m \in \mval(\melt \mtimes \melt') \Ra {}\\& \Exists \meltB. m \in \mval(\meltB \mtimes \melt') \land m \in \Sem{\vctx \proves \prop :\Prop}_\gamma(\meltB)
\end{aligned}
}
\end{align*}
......
theories/base_logic/double_negation.v
View file @ 3f321758
......@@ -30,11 +30,11 @@ Import uPred.
Lemma laterN_big n a x φ: ✓{n} x → a ≤ n → (▷^a ⌜φ⌝)%I n x → φ.
Proof.
induction 2 as [| ?? IHle].
- induction a; repeat (rewrite //= || uPred.unseal).
- induction a; repeat (rewrite //= || uPred.unseal).
intros Hlater. apply IHa; auto using cmra_validN_S.
move:Hlater; repeat (rewrite //= || uPred.unseal).
move:Hlater; repeat (rewrite //= || uPred.unseal).
- intros. apply IHle; auto using cmra_validN_S.
eapply uPred_closed; eauto using cmra_validN_S.
eapply uPred_mono; eauto using cmra_validN_S.
Qed.
Lemma laterN_small n a x φ: ✓{n} x → n < a → (▷^a ⌜φ⌝)%I n x.
......@@ -46,15 +46,15 @@ Proof.
- induction n as [| n IHn]; [| move: IHle];
repeat (rewrite //= || uPred.unseal).
red; rewrite //=. intros.
eapply (uPred_closed _ _ (S n)); eauto using cmra_validN_S.
eapply (uPred_mono _ _ (S n)); eauto using cmra_validN_S.
Qed.
(* It is easy to show that most of the basic properties of bupd that
are used throughout Iris hold for nnupd.
are used throughout Iris hold for nnupd.
In fact, the first three properties that follow hold for any
modality of the form (- -∗ Q) -∗ Q for arbitrary Q. The situation
here is slightly different, because nnupd is of the form
here is slightly different, because nnupd is of the form
∀ n, (- -∗ (Q n)) -∗ (Q n), but the proofs carry over straightforwardly.
*)
......@@ -77,8 +77,8 @@ Proof.
Qed.
Lemma nnupd_ownM_updateP x (Φ : M → Prop) :
x ~~>: Φ → uPred_ownM x =n=> ∃ y, ⌜Φ y⌝ ∧ uPred_ownM y.
Proof.
intros Hbupd. split. rewrite /uPred_nnupd. repeat uPred.unseal.
Proof.
intros Hbupd. split. rewrite /uPred_nnupd. repeat uPred.unseal.
intros n y ? Hown a.
red; rewrite //= => n' yf ??.
inversion Hown as (x'&Hequiv).
......@@ -87,18 +87,18 @@ Proof.
case (decide (a ≤ n')).
- intros Hle Hwand.
exfalso. eapply laterN_big; last (uPred.unseal; eapply (Hwand n' (y' ⋅ x'))); eauto.
* rewrite comm -assoc. done.
* rewrite comm -assoc. done.
* eexists. split; eapply uPred_mono; red; rewrite //=; eauto.
- intros; assert (n' < a). omega.
* rewrite comm -assoc. done.
* rewrite comm -assoc. done.
* exists y'. split=>//. by exists x'.
- intros; assert (n' < a). omega.
move: laterN_small. uPred.unseal.
naive_solver.
Qed.
(* However, the transitivity property seems to be much harder to
prove. This is surprising, because transitivity does hold for
prove. This is surprising, because transitivity does hold for
modalities of the form (- -∗ Q) -∗ Q. What goes wrong when we quantify
now over n?
now over n?
*)
Remark nnupd_trans P: (|=n=> |=n=> P) ⊢ (|=n=> P).
......@@ -111,7 +111,7 @@ Proof.
(* Oops -- the exponents of the later modality don't match up! *)
Abort.
(* Instead, we will need to prove this in the model. We start by showing that
(* Instead, we will need to prove this in the model. We start by showing that
nnupd is the limit of a the following sequence:
(- -∗ False) - ∗ False,
......@@ -121,12 +121,12 @@ Abort.
Then, it is easy enough to show that each of the uPreds in this sequence
is transitive. It turns out that this implies that nnupd is transitive. *)
(* The definition of the sequence above: *)
Fixpoint uPred_nnupd_k {M} k (P: uPred M) : uPred M :=
((P -∗ ▷^k False) -∗ ▷^k False) ∧
match k with
match k with
O => True
| S k' => uPred_nnupd_k k' P
end.
......@@ -138,11 +138,11 @@ Notation "|=n=>_ k Q" := (uPred_nnupd_k k Q)
(* One direction of the limiting process is easy -- nnupd implies nnupd_k for each k *)
Lemma nnupd_trunc1 k P: (|=n=> P) ⊢ |=n=>_k P.
Proof.
induction k.
- rewrite /uPred_nnupd_k /uPred_nnupd.
induction k.
- rewrite /uPred_nnupd_k /uPred_nnupd.
rewrite (forall_elim 0) //= right_id //.
- simpl. apply and_intro; auto.
rewrite /uPred_nnupd.
rewrite /uPred_nnupd.
rewrite (forall_elim (S k)) //=.
Qed.
......@@ -190,11 +190,10 @@ Lemma nnupd_nnupd_k_dist k P: (|=n=> P)%I ≡{k}≡ (|=n=>_k P)%I.
*** intros. exfalso. assert (n ≤ k'). omega.
assert (n = S k ∨ n < S k) as [->|] by omega.
**** eapply laterN_big; eauto; unseal. eapply HnnP; eauto.
**** move:nnupd_k_elim. unseal. intros Hnnupdk.
**** move:nnupd_k_elim. unseal. intros Hnnupdk.
eapply laterN_big; eauto. unseal.
eapply (Hnnupdk n k); first omega; eauto.
exists x, x'. split_and!; eauto. eapply uPred_closed; eauto.
eapply cmra_validN_op_l; eauto.
exists x, x'. split_and!; eauto. eapply uPred_mono; eauto.
** intros HP. eapply IHk; auto.
move:HP. unseal. intros (?&?); naive_solver.
Qed.
......@@ -204,13 +203,13 @@ Lemma nnupd_k_intro k P: P ⊢ (|=n=>_k P).
Proof.
induction k; rewrite //= ?right_id.
- apply wand_intro_l. apply wand_elim_l.
- apply and_intro; auto.
- apply and_intro; auto.
apply wand_intro_l. apply wand_elim_l.
Qed.
Lemma nnupd_k_mono k P Q: (P ⊢ Q) → (|=n=>_k P) ⊢ (|=n=>_k Q).
Proof.
induction k; rewrite //= ?right_id=>HPQ.
induction k; rewrite //= ?right_id=>HPQ.
- do 2 (apply wand_mono; auto).
- apply and_mono; auto; do 2 (apply wand_mono; auto).
Qed.
......@@ -228,13 +227,13 @@ Lemma nnupd_k_trans k P: (|=n=>_k |=n=>_k P) ⊢ (|=n=>_k P).
Proof.
revert P.
induction k; intros P.
- rewrite //= ?right_id. apply wand_intro_l.
- rewrite //= ?right_id. apply wand_intro_l.
rewrite {1}(nnupd_k_intro 0 (P -∗ False)%I) //= ?right_id. apply wand_elim_r.
- rewrite {2}(nnupd_k_unfold k P).
apply and_intro.
* rewrite (nnupd_k_unfold k P). rewrite and_elim_l.
rewrite nnupd_k_unfold. rewrite and_elim_l.
apply wand_intro_l.
apply wand_intro_l.
rewrite {1}(nnupd_k_intro (S k) (P -∗ ▷^(S k) (False)%I)).
rewrite nnupd_k_unfold and_elim_l. apply wand_elim_r.
* do 2 rewrite nnupd_k_weaken //.
......@@ -263,8 +262,8 @@ Proof.
case (decide (a ≤ n')).
- intros Hle Hwand.
exfalso. eapply laterN_big; last (uPred.unseal; eapply (Hwand n' x')); eauto.
* rewrite comm. done.
* rewrite comm. done.
* rewrite comm. done.
* rewrite comm. done.
- intros; assert (n' < a). omega.
move: laterN_small. uPred.unseal.
naive_solver.
......@@ -300,23 +299,23 @@ End classical.
Lemma nnupd_dne φ: (|=n=> ⌜¬¬ φ → φ⌝: uPred M)%I.
Proof.
rewrite /uPred_nnupd. apply forall_intro=>n.
apply wand_intro_l. rewrite ?right_id.
apply wand_intro_l. rewrite ?right_id.
assert (∀ φ, ¬¬¬¬φ → ¬¬φ) by naive_solver.
assert (Hdne: ¬¬ (¬¬φ → φ)) by naive_solver.
split. unseal. intros n' ?? Hupd.
case (decide (n' < n)).
- intros. move: laterN_small. unseal. naive_solver.
- intros. assert (n ≤ n'). omega.
- intros. assert (n ≤ n'). omega.
exfalso. specialize (Hupd n' ε).
eapply Hdne. intros Hfal.
eapply laterN_big; eauto.
eapply laterN_big; eauto.
unseal. rewrite right_id in Hupd *; naive_solver.
Qed.
(* Nevertheless, we can prove a weaker form of adequacy (which is equvialent to adequacy
under classical axioms) directly without passing through the proofs for bupd: *)
Lemma adequacy_helper1 P n k x:
✓{S n + k} x → ¬¬ (Nat.iter (S n) (λ P, |=n=> ▷ P)%I P (S n + k) x)
✓{S n + k} x → ¬¬ (Nat.iter (S n) (λ P, |=n=> ▷ P)%I P (S n + k) x)
→ ¬¬ (∃ x', ✓{n + k} (x') ∧ Nat.iter n (λ P, |=n=> ▷ P)%I P (n + k) (x')).
Proof.
revert k P x. induction n.
......@@ -326,12 +325,12 @@ Proof.
specialize (Hf3 (S k) (S k) ε). rewrite right_id in Hf3 *. unseal.
intros Hf3. eapply Hf3; eauto.
intros ??? Hx'. rewrite left_id in Hx' *=> Hx'.
unseal.
unseal.
assert (n' < S k ∨ n' = S k) as [|] by omega.
* intros. move:(laterN_small n' (S k) x' False). rewrite //=. unseal. intros Hsmall.
eapply Hsmall; eauto.
* subst. intros. exfalso. eapply Hf2. exists x'. split; eauto using cmra_validN_S.
- intros k P x Hx. rewrite ?Nat_iter_S_r.
- intros k P x Hx. rewrite ?Nat_iter_S_r.
replace (S (S n) + k) with (S n + (S k)) by omega.
replace (S n + k) with (n + (S k)) by omega.
intros. eapply IHn. replace (S n + S k) with (S (S n) + k) by omega. eauto.
......@@ -339,7 +338,7 @@ Proof.
Qed.
Lemma adequacy_helper2 P n k x:
✓{S n + k} x → ¬¬ (Nat.iter (S n) (λ P, |=n=> ▷ P)%I P (S n + k) x)
✓{S n + k} x → ¬¬ (Nat.iter (S n) (λ P, |=n=> ▷ P)%I P (S n + k) x)
→ ¬¬ (∃ x', ✓{k} (x') ∧ Nat.iter 0 (λ P, |=n=> ▷ P)%I P k (x')).
Proof.
revert x. induction n.
......
theories/base_logic/primitive.v
View file @ 3f321758
......@@ -35,11 +35,10 @@ Program Definition uPred_impl_def {M} (P Q : uPred M) : uPred M :=
{| uPred_holds n x := ∀ n' x',
x ≼ x' → n' ≤ n → ✓{n'} x' → P n' x' → Q n' x' |}.
Next Obligation.
intros M P Q n1 x1 x1' HPQ [x2 Hx1'] n2 x3 [x4 Hx3] ?; simpl in *.
intros M P Q n1 n1' x1 x1' HPQ [x2 Hx1'] Hn1 n2 x3 [x4 Hx3] ?; simpl in *.